Linux-libre 4.4-gnupck-4.4-gnu

16 files changed, 1366 insertions, 998 deletions

diff --git a/Documentation/filesystems/Makefile b/Documentation/filesystems/Makefile
index 13483d192..883010ce5 100644
--- a/Documentation/filesystems/Makefile
+++ b/Documentation/filesystems/Makefile
@@ -1,5 +1,3 @@
-subdir-y := configfs
-
 # List of programs to build
 hostprogs-y := dnotify_test
 
diff --git a/Documentation/filesystems/aufs/README b/Documentation/filesystems/aufs/README
index 2915102e0..e827ebfa8 100644
--- a/Documentation/filesystems/aufs/README
+++ b/Documentation/filesystems/aufs/README
@@ -106,7 +106,7 @@ git://git.kernel.org/.../torvalds/linux.git.
 And you cannot select CONFIG_AUFS_FS=m for this version, eg. you cannot
 build aufs4 as an external kernel module.
 Several extra patches are not included in this tree. Only
-aufs4-standalone tree contains them. They are describe in the later
+aufs4-standalone tree contains them. They are described in the later
 section "Configuration and Compilation."
 
 On the other hand, the aufs4-standalone tree has only aufs source files
@@ -262,6 +262,13 @@ optional. When you meet some problems, they will help you.
   duplication of inode number, which is important for backup tools and
   other utilities. When you find aufs XINO files for tmpfs branch
   growing too much, try this patch.
+- lockdep-debug.patch
+  Because aufs is not only an ordinary filesystem (callee of VFS), but
+  also a caller of VFS functions for branch filesystems, subclassing of
+  the internal locks for LOCKDEP is necessary. LOCKDEP is a debugging
+  feature of linux kernel. If you enable CONFIG_LOCKDEP, then you will
+  need to apply this debug patch to expand several constant values.
+  If don't know what LOCKDEP, then you don't have apply this patch.
 
 
 4. Usage
diff --git a/Documentation/filesystems/configfs/Makefile b/Documentation/filesystems/configfs/Makefile
deleted file mode 100644
index be7ec5e67..000000000
--- a/Documentation/filesystems/configfs/Makefile
+++ /dev/null
@@ -1,3 +0,0 @@
-ifneq ($(CONFIG_CONFIGFS_FS),)
-obj-m += configfs_example_explicit.o configfs_example_macros.o
-endif
diff --git a/Documentation/filesystems/configfs/configfs.txt b/Documentation/filesystems/configfs/configfs.txt
index b40fec9d3..af68efdbb 100644
--- a/Documentation/filesystems/configfs/configfs.txt
+++ b/Documentation/filesystems/configfs/configfs.txt
@@ -160,12 +160,6 @@ among other things.  For that, it needs a type.
 
 	struct configfs_item_operations {
 		void (*release)(struct config_item *);
-		ssize_t (*show_attribute)(struct config_item *,
-					  struct configfs_attribute *,
-					  char *);
-		ssize_t (*store_attribute)(struct config_item *,
-					   struct configfs_attribute *,
-					   const char *, size_t);
 		int (*allow_link)(struct config_item *src,
 				  struct config_item *target);
 		int (*drop_link)(struct config_item *src,
@@ -183,9 +177,7 @@ The most basic function of a config_item_type is to define what
 operations can be performed on a config_item.  All items that have been
 allocated dynamically will need to provide the ct_item_ops->release()
 method.  This method is called when the config_item's reference count
-reaches zero.  Items that wish to display an attribute need to provide
-the ct_item_ops->show_attribute() method.  Similarly, storing a new
-attribute value uses the store_attribute() method.
+reaches zero.
 
 [struct configfs_attribute]
 
@@ -193,6 +185,8 @@ attribute value uses the store_attribute() method.
 		char                    *ca_name;
 		struct module           *ca_owner;
 		umode_t                  ca_mode;
+		ssize_t (*show)(struct config_item *, char *);
+		ssize_t (*store)(struct config_item *, const char *, size_t);
 	};
 
 When a config_item wants an attribute to appear as a file in the item's
@@ -202,10 +196,10 @@ config_item_type->ct_attrs.  When the item appears in configfs, the
 attribute file will appear with the configfs_attribute->ca_name
 filename.  configfs_attribute->ca_mode specifies the file permissions.
 
-If an attribute is readable and the config_item provides a
-ct_item_ops->show_attribute() method, that method will be called
-whenever userspace asks for a read(2) on the attribute.  The converse
-will happen for write(2).
+If an attribute is readable and provides a ->show method, that method will
+be called whenever userspace asks for a read(2) on the attribute.  If an
+attribute is writable and provides a ->store  method, that method will be
+be called whenever userspace asks for a write(2) on the attribute.
 
 [struct config_group]
 
@@ -311,20 +305,10 @@ the subsystem must be ready for it.
 [An Example]
 
 The best example of these basic concepts is the simple_children
-subsystem/group and the simple_child item in configfs_example_explicit.c
-and configfs_example_macros.c.  It shows a trivial object displaying and
-storing an attribute, and a simple group creating and destroying these
-children.
-
-The only difference between configfs_example_explicit.c and
-configfs_example_macros.c is how the attributes of the childless item
-are defined.  The childless item has extended attributes, each with
-their own show()/store() operation.  This follows a convention commonly
-used in sysfs.  configfs_example_explicit.c creates these attributes
-by explicitly defining the structures involved.  Conversely
-configfs_example_macros.c uses some convenience macros from configfs.h
-to define the attributes.  These macros are similar to their sysfs
-counterparts.
+subsystem/group and the simple_child item in
+samples/configfs/configfs_sample.c. It shows a trivial object displaying
+and storing an attribute, and a simple group creating and destroying
+these children.
 
 [Hierarchy Navigation and the Subsystem Mutex]
 
diff --git a/Documentation/filesystems/configfs/configfs_example_explicit.c b/Documentation/filesystems/configfs/configfs_example_explicit.c
deleted file mode 100644
index 1420233df..000000000
--- a/Documentation/filesystems/configfs/configfs_example_explicit.c
+++ /dev/null
@@ -1,483 +0,0 @@
-/*
- * vim: noexpandtab ts=8 sts=0 sw=8:
- *
- * configfs_example_explicit.c - This file is a demonstration module
- *      containing a number of configfs subsystems.  It explicitly defines
- *      each structure without using the helper macros defined in
- *      configfs.h.
- *
- * This program is free software; you can redistribute it and/or
- * modify it under the terms of the GNU General Public
- * License as published by the Free Software Foundation; either
- * version 2 of the License, or (at your option) any later version.
- *
- * This program is distributed in the hope that it will be useful,
- * but WITHOUT ANY WARRANTY; without even the implied warranty of
- * MERCHANTABILITY or FITNESS FOR A PARTICULAR PURPOSE.  See the GNU
- * General Public License for more details.
- *
- * You should have received a copy of the GNU General Public
- * License along with this program; if not, write to the
- * Free Software Foundation, Inc., 59 Temple Place - Suite 330,
- * Boston, MA 021110-1307, USA.
- *
- * Based on sysfs:
- * 	sysfs is Copyright (C) 2001, 2002, 2003 Patrick Mochel
- *
- * configfs Copyright (C) 2005 Oracle.  All rights reserved.
- */
-
-#include <linux/init.h>
-#include <linux/module.h>
-#include <linux/slab.h>
-
-#include <linux/configfs.h>
-
-
-
-/*
- * 01-childless
- *
- * This first example is a childless subsystem.  It cannot create
- * any config_items.  It just has attributes.
- *
- * Note that we are enclosing the configfs_subsystem inside a container.
- * This is not necessary if a subsystem has no attributes directly
- * on the subsystem.  See the next example, 02-simple-children, for
- * such a subsystem.
- */
-
-struct childless {
-	struct configfs_subsystem subsys;
-	int showme;
-	int storeme;
-};
-
-struct childless_attribute {
-	struct configfs_attribute attr;
-	ssize_t (*show)(struct childless *, char *);
-	ssize_t (*store)(struct childless *, const char *, size_t);
-};
-
-static inline struct childless *to_childless(struct config_item *item)
-{
-	return item ? container_of(to_configfs_subsystem(to_config_group(item)), struct childless, subsys) : NULL;
-}
-
-static ssize_t childless_showme_read(struct childless *childless,
-				     char *page)
-{
-	ssize_t pos;
-
-	pos = sprintf(page, "%d\n", childless->showme);
-	childless->showme++;
-
-	return pos;
-}
-
-static ssize_t childless_storeme_read(struct childless *childless,
-				      char *page)
-{
-	return sprintf(page, "%d\n", childless->storeme);
-}
-
-static ssize_t childless_storeme_write(struct childless *childless,
-				       const char *page,
-				       size_t count)
-{
-	unsigned long tmp;
-	char *p = (char *) page;
-
-	tmp = simple_strtoul(p, &p, 10);
-	if ((*p != '\0') && (*p != '\n'))
-		return -EINVAL;
-
-	if (tmp > INT_MAX)
-		return -ERANGE;
-
-	childless->storeme = tmp;
-
-	return count;
-}
-
-static ssize_t childless_description_read(struct childless *childless,
-					  char *page)
-{
-	return sprintf(page,
-"[01-childless]\n"
-"\n"
-"The childless subsystem is the simplest possible subsystem in\n"
-"configfs.  It does not support the creation of child config_items.\n"
-"It only has a few attributes.  In fact, it isn't much different\n"
-"than a directory in /proc.\n");
-}
-
-static struct childless_attribute childless_attr_showme = {
-	.attr	= { .ca_owner = THIS_MODULE, .ca_name = "showme", .ca_mode = S_IRUGO },
-	.show	= childless_showme_read,
-};
-static struct childless_attribute childless_attr_storeme = {
-	.attr	= { .ca_owner = THIS_MODULE, .ca_name = "storeme", .ca_mode = S_IRUGO | S_IWUSR },
-	.show	= childless_storeme_read,
-	.store	= childless_storeme_write,
-};
-static struct childless_attribute childless_attr_description = {
-	.attr = { .ca_owner = THIS_MODULE, .ca_name = "description", .ca_mode = S_IRUGO },
-	.show = childless_description_read,
-};
-
-static struct configfs_attribute *childless_attrs[] = {
-	&childless_attr_showme.attr,
-	&childless_attr_storeme.attr,
-	&childless_attr_description.attr,
-	NULL,
-};
-
-static ssize_t childless_attr_show(struct config_item *item,
-				   struct configfs_attribute *attr,
-				   char *page)
-{
-	struct childless *childless = to_childless(item);
-	struct childless_attribute *childless_attr =
-		container_of(attr, struct childless_attribute, attr);
-	ssize_t ret = 0;
-
-	if (childless_attr->show)
-		ret = childless_attr->show(childless, page);
-	return ret;
-}
-
-static ssize_t childless_attr_store(struct config_item *item,
-				    struct configfs_attribute *attr,
-				    const char *page, size_t count)
-{
-	struct childless *childless = to_childless(item);
-	struct childless_attribute *childless_attr =
-		container_of(attr, struct childless_attribute, attr);
-	ssize_t ret = -EINVAL;
-
-	if (childless_attr->store)
-		ret = childless_attr->store(childless, page, count);
-	return ret;
-}
-
-static struct configfs_item_operations childless_item_ops = {
-	.show_attribute		= childless_attr_show,
-	.store_attribute	= childless_attr_store,
-};
-
-static struct config_item_type childless_type = {
-	.ct_item_ops	= &childless_item_ops,
-	.ct_attrs	= childless_attrs,
-	.ct_owner	= THIS_MODULE,
-};
-
-static struct childless childless_subsys = {
-	.subsys = {
-		.su_group = {
-			.cg_item = {
-				.ci_namebuf = "01-childless",
-				.ci_type = &childless_type,
-			},
-		},
-	},
-};
-
-
-/* ----------------------------------------------------------------- */
-
-/*
- * 02-simple-children
- *
- * This example merely has a simple one-attribute child.  Note that
- * there is no extra attribute structure, as the child's attribute is
- * known from the get-go.  Also, there is no container for the
- * subsystem, as it has no attributes of its own.
- */
-
-struct simple_child {
-	struct config_item item;
-	int storeme;
-};
-
-static inline struct simple_child *to_simple_child(struct config_item *item)
-{
-	return item ? container_of(item, struct simple_child, item) : NULL;
-}
-
-static struct configfs_attribute simple_child_attr_storeme = {
-	.ca_owner = THIS_MODULE,
-	.ca_name = "storeme",
-	.ca_mode = S_IRUGO | S_IWUSR,
-};
-
-static struct configfs_attribute *simple_child_attrs[] = {
-	&simple_child_attr_storeme,
-	NULL,
-};
-
-static ssize_t simple_child_attr_show(struct config_item *item,
-				      struct configfs_attribute *attr,
-				      char *page)
-{
-	ssize_t count;
-	struct simple_child *simple_child = to_simple_child(item);
-
-	count = sprintf(page, "%d\n", simple_child->storeme);
-
-	return count;
-}
-
-static ssize_t simple_child_attr_store(struct config_item *item,
-				       struct configfs_attribute *attr,
-				       const char *page, size_t count)
-{
-	struct simple_child *simple_child = to_simple_child(item);
-	unsigned long tmp;
-	char *p = (char *) page;
-
-	tmp = simple_strtoul(p, &p, 10);
-	if (!p || (*p && (*p != '\n')))
-		return -EINVAL;
-
-	if (tmp > INT_MAX)
-		return -ERANGE;
-
-	simple_child->storeme = tmp;
-
-	return count;
-}
-
-static void simple_child_release(struct config_item *item)
-{
-	kfree(to_simple_child(item));
-}
-
-static struct configfs_item_operations simple_child_item_ops = {
-	.release		= simple_child_release,
-	.show_attribute		= simple_child_attr_show,
-	.store_attribute	= simple_child_attr_store,
-};
-
-static struct config_item_type simple_child_type = {
-	.ct_item_ops	= &simple_child_item_ops,
-	.ct_attrs	= simple_child_attrs,
-	.ct_owner	= THIS_MODULE,
-};
-
-
-struct simple_children {
-	struct config_group group;
-};
-
-static inline struct simple_children *to_simple_children(struct config_item *item)
-{
-	return item ? container_of(to_config_group(item), struct simple_children, group) : NULL;
-}
-
-static struct config_item *simple_children_make_item(struct config_group *group, const char *name)
-{
-	struct simple_child *simple_child;
-
-	simple_child = kzalloc(sizeof(struct simple_child), GFP_KERNEL);
-	if (!simple_child)
-		return ERR_PTR(-ENOMEM);
-
-	config_item_init_type_name(&simple_child->item, name,
-				   &simple_child_type);
-
-	simple_child->storeme = 0;
-
-	return &simple_child->item;
-}
-
-static struct configfs_attribute simple_children_attr_description = {
-	.ca_owner = THIS_MODULE,
-	.ca_name = "description",
-	.ca_mode = S_IRUGO,
-};
-
-static struct configfs_attribute *simple_children_attrs[] = {
-	&simple_children_attr_description,
-	NULL,
-};
-
-static ssize_t simple_children_attr_show(struct config_item *item,
-					 struct configfs_attribute *attr,
-					 char *page)
-{
-	return sprintf(page,
-"[02-simple-children]\n"
-"\n"
-"This subsystem allows the creation of child config_items.  These\n"
-"items have only one attribute that is readable and writeable.\n");
-}
-
-static void simple_children_release(struct config_item *item)
-{
-	kfree(to_simple_children(item));
-}
-
-static struct configfs_item_operations simple_children_item_ops = {
-	.release	= simple_children_release,
-	.show_attribute	= simple_children_attr_show,
-};
-
-/*
- * Note that, since no extra work is required on ->drop_item(),
- * no ->drop_item() is provided.
- */
-static struct configfs_group_operations simple_children_group_ops = {
-	.make_item	= simple_children_make_item,
-};
-
-static struct config_item_type simple_children_type = {
-	.ct_item_ops	= &simple_children_item_ops,
-	.ct_group_ops	= &simple_children_group_ops,
-	.ct_attrs	= simple_children_attrs,
-	.ct_owner	= THIS_MODULE,
-};
-
-static struct configfs_subsystem simple_children_subsys = {
-	.su_group = {
-		.cg_item = {
-			.ci_namebuf = "02-simple-children",
-			.ci_type = &simple_children_type,
-		},
-	},
-};
-
-
-/* ----------------------------------------------------------------- */
-
-/*
- * 03-group-children
- *
- * This example reuses the simple_children group from above.  However,
- * the simple_children group is not the subsystem itself, it is a
- * child of the subsystem.  Creation of a group in the subsystem creates
- * a new simple_children group.  That group can then have simple_child
- * children of its own.
- */
-
-static struct config_group *group_children_make_group(struct config_group *group, const char *name)
-{
-	struct simple_children *simple_children;
-
-	simple_children = kzalloc(sizeof(struct simple_children),
-				  GFP_KERNEL);
-	if (!simple_children)
-		return ERR_PTR(-ENOMEM);
-
-	config_group_init_type_name(&simple_children->group, name,
-				    &simple_children_type);
-
-	return &simple_children->group;
-}
-
-static struct configfs_attribute group_children_attr_description = {
-	.ca_owner = THIS_MODULE,
-	.ca_name = "description",
-	.ca_mode = S_IRUGO,
-};
-
-static struct configfs_attribute *group_children_attrs[] = {
-	&group_children_attr_description,
-	NULL,
-};
-
-static ssize_t group_children_attr_show(struct config_item *item,
-					struct configfs_attribute *attr,
-					char *page)
-{
-	return sprintf(page,
-"[03-group-children]\n"
-"\n"
-"This subsystem allows the creation of child config_groups.  These\n"
-"groups are like the subsystem simple-children.\n");
-}
-
-static struct configfs_item_operations group_children_item_ops = {
-	.show_attribute	= group_children_attr_show,
-};
-
-/*
- * Note that, since no extra work is required on ->drop_item(),
- * no ->drop_item() is provided.
- */
-static struct configfs_group_operations group_children_group_ops = {
-	.make_group	= group_children_make_group,
-};
-
-static struct config_item_type group_children_type = {
-	.ct_item_ops	= &group_children_item_ops,
-	.ct_group_ops	= &group_children_group_ops,
-	.ct_attrs	= group_children_attrs,
-	.ct_owner	= THIS_MODULE,
-};
-
-static struct configfs_subsystem group_children_subsys = {
-	.su_group = {
-		.cg_item = {
-			.ci_namebuf = "03-group-children",
-			.ci_type = &group_children_type,
-		},
-	},
-};
-
-/* ----------------------------------------------------------------- */
-
-/*
- * We're now done with our subsystem definitions.
- * For convenience in this module, here's a list of them all.  It
- * allows the init function to easily register them.  Most modules
- * will only have one subsystem, and will only call register_subsystem
- * on it directly.
- */
-static struct configfs_subsystem *example_subsys[] = {
-	&childless_subsys.subsys,
-	&simple_children_subsys,
-	&group_children_subsys,
-	NULL,
-};
-
-static int __init configfs_example_init(void)
-{
-	int ret;
-	int i;
-	struct configfs_subsystem *subsys;
-
-	for (i = 0; example_subsys[i]; i++) {
-		subsys = example_subsys[i];
-
-		config_group_init(&subsys->su_group);
-		mutex_init(&subsys->su_mutex);
-		ret = configfs_register_subsystem(subsys);
-		if (ret) {
-			printk(KERN_ERR "Error %d while registering subsystem %s\n",
-			       ret,
-			       subsys->su_group.cg_item.ci_namebuf);
-			goto out_unregister;
-		}
-	}
-
-	return 0;
-
-out_unregister:
-	for (i--; i >= 0; i--)
-		configfs_unregister_subsystem(example_subsys[i]);
-
-	return ret;
-}
-
-static void __exit configfs_example_exit(void)
-{
-	int i;
-
-	for (i = 0; example_subsys[i]; i++)
-		configfs_unregister_subsystem(example_subsys[i]);
-}
-
-module_init(configfs_example_init);
-module_exit(configfs_example_exit);
-MODULE_LICENSE("GPL");
diff --git a/Documentation/filesystems/configfs/configfs_example_macros.c b/Documentation/filesystems/configfs/configfs_example_macros.c
deleted file mode 100644
index 327dfbc64..000000000
--- a/Documentation/filesystems/configfs/configfs_example_macros.c
+++ /dev/null
@@ -1,446 +0,0 @@
-/*
- * vim: noexpandtab ts=8 sts=0 sw=8:
- *
- * configfs_example_macros.c - This file is a demonstration module
- *      containing a number of configfs subsystems.  It uses the helper
- *      macros defined by configfs.h
- *
- * This program is free software; you can redistribute it and/or
- * modify it under the terms of the GNU General Public
- * License as published by the Free Software Foundation; either
- * version 2 of the License, or (at your option) any later version.
- *
- * This program is distributed in the hope that it will be useful,
- * but WITHOUT ANY WARRANTY; without even the implied warranty of
- * MERCHANTABILITY or FITNESS FOR A PARTICULAR PURPOSE.  See the GNU
- * General Public License for more details.
- *
- * You should have received a copy of the GNU General Public
- * License along with this program; if not, write to the
- * Free Software Foundation, Inc., 59 Temple Place - Suite 330,
- * Boston, MA 021110-1307, USA.
- *
- * Based on sysfs:
- * 	sysfs is Copyright (C) 2001, 2002, 2003 Patrick Mochel
- *
- * configfs Copyright (C) 2005 Oracle.  All rights reserved.
- */
-
-#include <linux/init.h>
-#include <linux/module.h>
-#include <linux/slab.h>
-
-#include <linux/configfs.h>
-
-
-
-/*
- * 01-childless
- *
- * This first example is a childless subsystem.  It cannot create
- * any config_items.  It just has attributes.
- *
- * Note that we are enclosing the configfs_subsystem inside a container.
- * This is not necessary if a subsystem has no attributes directly
- * on the subsystem.  See the next example, 02-simple-children, for
- * such a subsystem.
- */
-
-struct childless {
-	struct configfs_subsystem subsys;
-	int showme;
-	int storeme;
-};
-
-static inline struct childless *to_childless(struct config_item *item)
-{
-	return item ? container_of(to_configfs_subsystem(to_config_group(item)), struct childless, subsys) : NULL;
-}
-
-CONFIGFS_ATTR_STRUCT(childless);
-#define CHILDLESS_ATTR(_name, _mode, _show, _store)	\
-struct childless_attribute childless_attr_##_name = __CONFIGFS_ATTR(_name, _mode, _show, _store)
-#define CHILDLESS_ATTR_RO(_name, _show)	\
-struct childless_attribute childless_attr_##_name = __CONFIGFS_ATTR_RO(_name, _show);
-
-static ssize_t childless_showme_read(struct childless *childless,
-				     char *page)
-{
-	ssize_t pos;
-
-	pos = sprintf(page, "%d\n", childless->showme);
-	childless->showme++;
-
-	return pos;
-}
-
-static ssize_t childless_storeme_read(struct childless *childless,
-				      char *page)
-{
-	return sprintf(page, "%d\n", childless->storeme);
-}
-
-static ssize_t childless_storeme_write(struct childless *childless,
-				       const char *page,
-				       size_t count)
-{
-	unsigned long tmp;
-	char *p = (char *) page;
-
-	tmp = simple_strtoul(p, &p, 10);
-	if (!p || (*p && (*p != '\n')))
-		return -EINVAL;
-
-	if (tmp > INT_MAX)
-		return -ERANGE;
-
-	childless->storeme = tmp;
-
-	return count;
-}
-
-static ssize_t childless_description_read(struct childless *childless,
-					  char *page)
-{
-	return sprintf(page,
-"[01-childless]\n"
-"\n"
-"The childless subsystem is the simplest possible subsystem in\n"
-"configfs.  It does not support the creation of child config_items.\n"
-"It only has a few attributes.  In fact, it isn't much different\n"
-"than a directory in /proc.\n");
-}
-
-CHILDLESS_ATTR_RO(showme, childless_showme_read);
-CHILDLESS_ATTR(storeme, S_IRUGO | S_IWUSR, childless_storeme_read,
-	       childless_storeme_write);
-CHILDLESS_ATTR_RO(description, childless_description_read);
-
-static struct configfs_attribute *childless_attrs[] = {
-	&childless_attr_showme.attr,
-	&childless_attr_storeme.attr,
-	&childless_attr_description.attr,
-	NULL,
-};
-
-CONFIGFS_ATTR_OPS(childless);
-static struct configfs_item_operations childless_item_ops = {
-	.show_attribute		= childless_attr_show,
-	.store_attribute	= childless_attr_store,
-};
-
-static struct config_item_type childless_type = {
-	.ct_item_ops	= &childless_item_ops,
-	.ct_attrs	= childless_attrs,
-	.ct_owner	= THIS_MODULE,
-};
-
-static struct childless childless_subsys = {
-	.subsys = {
-		.su_group = {
-			.cg_item = {
-				.ci_namebuf = "01-childless",
-				.ci_type = &childless_type,
-			},
-		},
-	},
-};
-
-
-/* ----------------------------------------------------------------- */
-
-/*
- * 02-simple-children
- *
- * This example merely has a simple one-attribute child.  Note that
- * there is no extra attribute structure, as the child's attribute is
- * known from the get-go.  Also, there is no container for the
- * subsystem, as it has no attributes of its own.
- */
-
-struct simple_child {
-	struct config_item item;
-	int storeme;
-};
-
-static inline struct simple_child *to_simple_child(struct config_item *item)
-{
-	return item ? container_of(item, struct simple_child, item) : NULL;
-}
-
-static struct configfs_attribute simple_child_attr_storeme = {
-	.ca_owner = THIS_MODULE,
-	.ca_name = "storeme",
-	.ca_mode = S_IRUGO | S_IWUSR,
-};
-
-static struct configfs_attribute *simple_child_attrs[] = {
-	&simple_child_attr_storeme,
-	NULL,
-};
-
-static ssize_t simple_child_attr_show(struct config_item *item,
-				      struct configfs_attribute *attr,
-				      char *page)
-{
-	ssize_t count;
-	struct simple_child *simple_child = to_simple_child(item);
-
-	count = sprintf(page, "%d\n", simple_child->storeme);
-
-	return count;
-}
-
-static ssize_t simple_child_attr_store(struct config_item *item,
-				       struct configfs_attribute *attr,
-				       const char *page, size_t count)
-{
-	struct simple_child *simple_child = to_simple_child(item);
-	unsigned long tmp;
-	char *p = (char *) page;
-
-	tmp = simple_strtoul(p, &p, 10);
-	if (!p || (*p && (*p != '\n')))
-		return -EINVAL;
-
-	if (tmp > INT_MAX)
-		return -ERANGE;
-
-	simple_child->storeme = tmp;
-
-	return count;
-}
-
-static void simple_child_release(struct config_item *item)
-{
-	kfree(to_simple_child(item));
-}
-
-static struct configfs_item_operations simple_child_item_ops = {
-	.release		= simple_child_release,
-	.show_attribute		= simple_child_attr_show,
-	.store_attribute	= simple_child_attr_store,
-};
-
-static struct config_item_type simple_child_type = {
-	.ct_item_ops	= &simple_child_item_ops,
-	.ct_attrs	= simple_child_attrs,
-	.ct_owner	= THIS_MODULE,
-};
-
-
-struct simple_children {
-	struct config_group group;
-};
-
-static inline struct simple_children *to_simple_children(struct config_item *item)
-{
-	return item ? container_of(to_config_group(item), struct simple_children, group) : NULL;
-}
-
-static struct config_item *simple_children_make_item(struct config_group *group, const char *name)
-{
-	struct simple_child *simple_child;
-
-	simple_child = kzalloc(sizeof(struct simple_child), GFP_KERNEL);
-	if (!simple_child)
-		return ERR_PTR(-ENOMEM);
-
-	config_item_init_type_name(&simple_child->item, name,
-				   &simple_child_type);
-
-	simple_child->storeme = 0;
-
-	return &simple_child->item;
-}
-
-static struct configfs_attribute simple_children_attr_description = {
-	.ca_owner = THIS_MODULE,
-	.ca_name = "description",
-	.ca_mode = S_IRUGO,
-};
-
-static struct configfs_attribute *simple_children_attrs[] = {
-	&simple_children_attr_description,
-	NULL,
-};
-
-static ssize_t simple_children_attr_show(struct config_item *item,
-					 struct configfs_attribute *attr,
-					 char *page)
-{
-	return sprintf(page,
-"[02-simple-children]\n"
-"\n"
-"This subsystem allows the creation of child config_items.  These\n"
-"items have only one attribute that is readable and writeable.\n");
-}
-
-static void simple_children_release(struct config_item *item)
-{
-	kfree(to_simple_children(item));
-}
-
-static struct configfs_item_operations simple_children_item_ops = {
-	.release	= simple_children_release,
-	.show_attribute	= simple_children_attr_show,
-};
-
-/*
- * Note that, since no extra work is required on ->drop_item(),
- * no ->drop_item() is provided.
- */
-static struct configfs_group_operations simple_children_group_ops = {
-	.make_item	= simple_children_make_item,
-};
-
-static struct config_item_type simple_children_type = {
-	.ct_item_ops	= &simple_children_item_ops,
-	.ct_group_ops	= &simple_children_group_ops,
-	.ct_attrs	= simple_children_attrs,
-	.ct_owner	= THIS_MODULE,
-};
-
-static struct configfs_subsystem simple_children_subsys = {
-	.su_group = {
-		.cg_item = {
-			.ci_namebuf = "02-simple-children",
-			.ci_type = &simple_children_type,
-		},
-	},
-};
-
-
-/* ----------------------------------------------------------------- */
-
-/*
- * 03-group-children
- *
- * This example reuses the simple_children group from above.  However,
- * the simple_children group is not the subsystem itself, it is a
- * child of the subsystem.  Creation of a group in the subsystem creates
- * a new simple_children group.  That group can then have simple_child
- * children of its own.
- */
-
-static struct config_group *group_children_make_group(struct config_group *group, const char *name)
-{
-	struct simple_children *simple_children;
-
-	simple_children = kzalloc(sizeof(struct simple_children),
-				  GFP_KERNEL);
-	if (!simple_children)
-		return ERR_PTR(-ENOMEM);
-
-	config_group_init_type_name(&simple_children->group, name,
-				    &simple_children_type);
-
-	return &simple_children->group;
-}
-
-static struct configfs_attribute group_children_attr_description = {
-	.ca_owner = THIS_MODULE,
-	.ca_name = "description",
-	.ca_mode = S_IRUGO,
-};
-
-static struct configfs_attribute *group_children_attrs[] = {
-	&group_children_attr_description,
-	NULL,
-};
-
-static ssize_t group_children_attr_show(struct config_item *item,
-					struct configfs_attribute *attr,
-					char *page)
-{
-	return sprintf(page,
-"[03-group-children]\n"
-"\n"
-"This subsystem allows the creation of child config_groups.  These\n"
-"groups are like the subsystem simple-children.\n");
-}
-
-static struct configfs_item_operations group_children_item_ops = {
-	.show_attribute	= group_children_attr_show,
-};
-
-/*
- * Note that, since no extra work is required on ->drop_item(),
- * no ->drop_item() is provided.
- */
-static struct configfs_group_operations group_children_group_ops = {
-	.make_group	= group_children_make_group,
-};
-
-static struct config_item_type group_children_type = {
-	.ct_item_ops	= &group_children_item_ops,
-	.ct_group_ops	= &group_children_group_ops,
-	.ct_attrs	= group_children_attrs,
-	.ct_owner	= THIS_MODULE,
-};
-
-static struct configfs_subsystem group_children_subsys = {
-	.su_group = {
-		.cg_item = {
-			.ci_namebuf = "03-group-children",
-			.ci_type = &group_children_type,
-		},
-	},
-};
-
-/* ----------------------------------------------------------------- */
-
-/*
- * We're now done with our subsystem definitions.
- * For convenience in this module, here's a list of them all.  It
- * allows the init function to easily register them.  Most modules
- * will only have one subsystem, and will only call register_subsystem
- * on it directly.
- */
-static struct configfs_subsystem *example_subsys[] = {
-	&childless_subsys.subsys,
-	&simple_children_subsys,
-	&group_children_subsys,
-	NULL,
-};
-
-static int __init configfs_example_init(void)
-{
-	int ret;
-	int i;
-	struct configfs_subsystem *subsys;
-
-	for (i = 0; example_subsys[i]; i++) {
-		subsys = example_subsys[i];
-
-		config_group_init(&subsys->su_group);
-		mutex_init(&subsys->su_mutex);
-		ret = configfs_register_subsystem(subsys);
-		if (ret) {
-			printk(KERN_ERR "Error %d while registering subsystem %s\n",
-			       ret,
-			       subsys->su_group.cg_item.ci_namebuf);
-			goto out_unregister;
-		}
-	}
-
-	return 0;
-
-out_unregister:
-	for (i--; i >= 0; i--)
-		configfs_unregister_subsystem(example_subsys[i]);
-
-	return ret;
-}
-
-static void __exit configfs_example_exit(void)
-{
-	int i;
-
-	for (i = 0; example_subsys[i]; i++)
-		configfs_unregister_subsystem(example_subsys[i]);
-}
-
-module_init(configfs_example_init);
-module_exit(configfs_example_exit);
-MODULE_LICENSE("GPL");
diff --git a/Documentation/filesystems/debugfs.txt b/Documentation/filesystems/debugfs.txt
index 463f59573..4f45f7114 100644
--- a/Documentation/filesystems/debugfs.txt
+++ b/Documentation/filesystems/debugfs.txt
@@ -105,7 +105,7 @@ a variable of type size_t.
 Boolean values can be placed in debugfs with:
 
     struct dentry *debugfs_create_bool(const char *name, umode_t mode,
-				       struct dentry *parent, u32 *value);
+				       struct dentry *parent, bool *value);
 
 A read on the resulting file will yield either Y (for non-zero values) or
 N, followed by a newline.  If written to, it will accept either upper- or
diff --git a/Documentation/filesystems/f2fs.txt b/Documentation/filesystems/f2fs.txt
index e2d5105b7..b102b4365 100644
--- a/Documentation/filesystems/f2fs.txt
+++ b/Documentation/filesystems/f2fs.txt
@@ -102,7 +102,8 @@ background_gc=%s       Turn on/off cleaning operations, namely garbage
                        collection, triggered in background when I/O subsystem is
                        idle. If background_gc=on, it will turn on the garbage
                        collection and if background_gc=off, garbage collection
-                       will be truned off.
+                       will be truned off. If background_gc=sync, it will turn
+                       on synchronous garbage collection running in background.
                        Default value for this option is on. So garbage
                        collection is on by default.
 disable_roll_forward   Disable the roll-forward recovery routine
diff --git a/Documentation/filesystems/gfs2-glocks.txt b/Documentation/filesystems/gfs2-glocks.txt
index fcc79957b..1fb12f9df 100644
--- a/Documentation/filesystems/gfs2-glocks.txt
+++ b/Documentation/filesystems/gfs2-glocks.txt
@@ -5,7 +5,7 @@ This documents the basic principles of the glock state machine
 internals. Each glock (struct gfs2_glock in fs/gfs2/incore.h)
 has two main (internal) locks:
 
- 1. A spinlock (gl_spin) which protects the internal state such
+ 1. A spinlock (gl_lockref.lock) which protects the internal state such
     as gl_state, gl_target and the list of holders (gl_holders)
  2. A non-blocking bit lock, GLF_LOCK, which is used to prevent other
     threads from making calls to the DLM, etc. at the same time. If a
@@ -82,8 +82,8 @@ rather than via the glock.
 
 Locking rules for glock operations:
 
-Operation     |  GLF_LOCK bit lock held |  gl_spin spinlock held
------------------------------------------------------------------
+Operation     |  GLF_LOCK bit lock held |  gl_lockref.lock spinlock held
+-------------------------------------------------------------------------
 go_xmote_th   |       Yes               |       No
 go_xmote_bh   |       Yes               |       No
 go_inval      |       Yes               |       No
diff --git a/Documentation/filesystems/nfs/nfsroot.txt b/Documentation/filesystems/nfs/nfsroot.txt
index 2d66ed688..bb5ab6de5 100644
--- a/Documentation/filesystems/nfs/nfsroot.txt
+++ b/Documentation/filesystems/nfs/nfsroot.txt
@@ -157,6 +157,9 @@ ip=<client-ip>:<server-ip>:<gw-ip>:<netmask>:<hostname>:<device>:<autoconf>:
 		  both:        use both BOOTP and RARP but not DHCP
 		               (old option kept for backwards compatibility)
 
+		if dhcp is used, the client identifier can be used by following
+		format "ip=dhcp,client-id-type,client-id-value"
+
                 Default: any
 
   <dns0-ip>	IP address of first nameserver.
diff --git a/Documentation/filesystems/overlayfs.txt b/Documentation/filesystems/overlayfs.txt
index 6db0e5d1d..28091457b 100644
--- a/Documentation/filesystems/overlayfs.txt
+++ b/Documentation/filesystems/overlayfs.txt
@@ -1,4 +1,5 @@
-Written by: Neil Brown <neilb@suse.de>
+Written by: Neil Brown
+Please see MAINTAINERS file for where to send questions.
 
 Overlay Filesystem
 ==================
diff --git a/Documentation/filesystems/path-lookup.md b/Documentation/filesystems/path-lookup.md
new file mode 100644
index 000000000..1b39e084a
--- /dev/null
+++ b/Documentation/filesystems/path-lookup.md
@@ -0,0 +1,1297 @@
+<head>
+<style> p { max-width:50em} ol, ul {max-width: 40em}</style>
+</head>
+
+Pathname lookup in Linux.
+=========================
+
+This write-up is based on three articles published at lwn.net:
+
+- <https://lwn.net/Articles/649115/> Pathname lookup in Linux
+- <https://lwn.net/Articles/649729/> RCU-walk: faster pathname lookup in Linux
+- <https://lwn.net/Articles/650786/> A walk among the symlinks
+
+Written by Neil Brown with help from Al Viro and Jon Corbet.
+
+Introduction
+------------
+
+The most obvious aspect of pathname lookup, which very little
+exploration is needed to discover, is that it is complex.  There are
+many rules, special cases, and implementation alternatives that all
+combine to confuse the unwary reader.  Computer science has long been
+acquainted with such complexity and has tools to help manage it.  One
+tool that we will make extensive use of is "divide and conquer".  For
+the early parts of the analysis we will divide off symlinks - leaving
+them until the final part.  Well before we get to symlinks we have
+another major division based on the VFS's approach to locking which
+will allow us to review "REF-walk" and "RCU-walk" separately.  But we
+are getting ahead of ourselves.  There are some important low level
+distinctions we need to clarify first.
+
+There are two sorts of ...
+--------------------------
+
+[`openat()`]: http://man7.org/linux/man-pages/man2/openat.2.html
+
+Pathnames (sometimes "file names"), used to identify objects in the
+filesystem, will be familiar to most readers.  They contain two sorts
+of elements: "slashes" that are sequences of one or more "`/`"
+characters, and "components" that are sequences of one or more
+non-"`/`" characters.  These form two kinds of paths.  Those that
+start with slashes are "absolute" and start from the filesystem root.
+The others are "relative" and start from the current directory, or
+from some other location specified by a file descriptor given to a
+"xxx`at`" system call such as "[`openat()`]".
+
+[`execveat()`]: http://man7.org/linux/man-pages/man2/execveat.2.html
+
+It is tempting to describe the second kind as starting with a
+component, but that isn't always accurate: a pathname can lack both
+slashes and components, it can be empty, in other words.  This is
+generally forbidden in POSIX, but some of those "xxx`at`" system calls
+in Linux permit it when the `AT_EMPTY_PATH` flag is given.  For
+example, if you have an open file descriptor on an executable file you
+can execute it by calling [`execveat()`] passing the file descriptor,
+an empty path, and the `AT_EMPTY_PATH` flag.
+
+These paths can be divided into two sections: the final component and
+everything else.  The "everything else" is the easy bit.  In all cases
+it must identify a directory that already exists, otherwise an error
+such as `ENOENT` or `ENOTDIR` will be reported.
+
+The final component is not so simple.  Not only do different system
+calls interpret it quite differently (e.g. some create it, some do
+not), but it might not even exist: neither the empty pathname nor the
+pathname that is just slashes have a final component.  If it does
+exist, it could be "`.`" or "`..`" which are handled quite differently
+from other components.
+
+[POSIX]: http://pubs.opengroup.org/onlinepubs/9699919799/basedefs/V1_chap04.html#tag_04_12
+
+If a pathname ends with a slash, such as "`/tmp/foo/`" it might be
+tempting to consider that to have an empty final component.  In many
+ways that would lead to correct results, but not always.  In
+particular, `mkdir()` and `rmdir()` each create or remove a directory named
+by the final component, and they are required to work with pathnames
+ending in "`/`".  According to [POSIX]
+
+> A pathname that contains at least one non- &lt;slash> character and
+> that ends with one or more trailing &lt;slash> characters shall not
+> be resolved successfully unless the last pathname component before
+> the trailing <slash> characters names an existing directory or a
+> directory entry that is to be created for a directory immediately
+> after the pathname is resolved.
+
+The Linux pathname walking code (mostly in `fs/namei.c`) deals with
+all of these issues: breaking the path into components, handling the
+"everything else" quite separately from the final component, and
+checking that the trailing slash is not used where it isn't
+permitted.  It also addresses the important issue of concurrent
+access.
+
+While one process is looking up a pathname, another might be making
+changes that affect that lookup.  One fairly extreme case is that if
+"a/b" were renamed to "a/c/b" while another process were looking up
+"a/b/..", that process might successfully resolve on "a/c".
+Most races are much more subtle, and a big part of the task of
+pathname lookup is to prevent them from having damaging effects.  Many
+of the possible races are seen most clearly in the context of the
+"dcache" and an understanding of that is central to understanding
+pathname lookup.
+
+More than just a cache.
+-----------------------
+
+The "dcache" caches information about names in each filesystem to
+make them quickly available for lookup.  Each entry (known as a
+"dentry") contains three significant fields: a component name, a
+pointer to a parent dentry, and a pointer to the "inode" which
+contains further information about the object in that parent with
+the given name.  The inode pointer can be `NULL` indicating that the
+name doesn't exist in the parent.  While there can be linkage in the
+dentry of a directory to the dentries of the children, that linkage is
+not used for pathname lookup, and so will not be considered here.
+
+The dcache has a number of uses apart from accelerating lookup.  One
+that will be particularly relevant is that it is closely integrated
+with the mount table that records which filesystem is mounted where.
+What the mount table actually stores is which dentry is mounted on top
+of which other dentry.
+
+When considering the dcache, we have another of our "two types"
+distinctions: there are two types of filesystems.
+
+Some filesystems ensure that the information in the dcache is always
+completely accurate (though not necessarily complete).  This can allow
+the VFS to determine if a particular file does or doesn't exist
+without checking with the filesystem, and means that the VFS can
+protect the filesystem against certain races and other problems.
+These are typically "local" filesystems such as ext3, XFS, and Btrfs.
+
+Other filesystems don't provide that guarantee because they cannot.
+These are typically filesystems that are shared across a network,
+whether remote filesystems like NFS and 9P, or cluster filesystems
+like ocfs2 or cephfs.  These filesystems allow the VFS to revalidate
+cached information, and must provide their own protection against
+awkward races.  The VFS can detect these filesystems by the
+`DCACHE_OP_REVALIDATE` flag being set in the dentry.
+
+REF-walk: simple concurrency management with refcounts and spinlocks
+--------------------------------------------------------------------
+
+With all of those divisions carefully classified, we can now start
+looking at the actual process of walking along a path.  In particular
+we will start with the handling of the "everything else" part of a
+pathname, and focus on the "REF-walk" approach to concurrency
+management.  This code is found in the `link_path_walk()` function, if
+you ignore all the places that only run when "`LOOKUP_RCU`"
+(indicating the use of RCU-walk) is set.
+
+[Meet the Lockers]: https://lwn.net/Articles/453685/
+
+REF-walk is fairly heavy-handed with locks and reference counts.  Not
+as heavy-handed as in the old "big kernel lock" days, but certainly not
+afraid of taking a lock when one is needed.  It uses a variety of
+different concurrency controls.  A background understanding of the
+various primitives is assumed, or can be gleaned from elsewhere such
+as in [Meet the Lockers].
+
+The locking mechanisms used by REF-walk include:
+
+### dentry->d_lockref ###
+
+This uses the lockref primitive to provide both a spinlock and a
+reference count.  The special-sauce of this primitive is that the
+conceptual sequence "lock; inc_ref; unlock;" can often be performed
+with a single atomic memory operation.
+
+Holding a reference on a dentry ensures that the dentry won't suddenly
+be freed and used for something else, so the values in various fields
+will behave as expected.  It also protects the `->d_inode` reference
+to the inode to some extent.
+
+The association between a dentry and its inode is fairly permanent.
+For example, when a file is renamed, the dentry and inode move
+together to the new location.  When a file is created the dentry will
+initially be negative (i.e. `d_inode` is `NULL`), and will be assigned
+to the new inode as part of the act of creation.
+
+When a file is deleted, this can be reflected in the cache either by
+setting `d_inode` to `NULL`, or by removing it from the hash table
+(described shortly) used to look up the name in the parent directory.
+If the dentry is still in use the second option is used as it is
+perfectly legal to keep using an open file after it has been deleted
+and having the dentry around helps.  If the dentry is not otherwise in
+use (i.e. if the refcount in `d_lockref` is one), only then will
+`d_inode` be set to `NULL`.  Doing it this way is more efficient for a
+very common case.
+
+So as long as a counted reference is held to a dentry, a non-`NULL` `->d_inode`
+value will never be changed.
+
+### dentry->d_lock ###
+
+`d_lock` is a synonym for the spinlock that is part of `d_lockref` above.
+For our purposes, holding this lock protects against the dentry being
+renamed or unlinked.  In particular, its parent (`d_parent`), and its
+name (`d_name`) cannot be changed, and it cannot be removed from the
+dentry hash table.
+
+When looking for a name in a directory, REF-walk takes `d_lock` on
+each candidate dentry that it finds in the hash table and then checks
+that the parent and name are correct.  So it doesn't lock the parent
+while searching in the cache; it only locks children.
+
+When looking for the parent for a given name (to handle "`..`"),
+REF-walk can take `d_lock` to get a stable reference to `d_parent`,
+but it first tries a more lightweight approach.  As seen in
+`dget_parent()`, if a reference can be claimed on the parent, and if
+subsequently `d_parent` can be seen to have not changed, then there is
+no need to actually take the lock on the child.
+
+### rename_lock ###
+
+Looking up a given name in a given directory involves computing a hash
+from the two values (the name and the dentry of the directory),
+accessing that slot in a hash table, and searching the linked list
+that is found there.
+
+When a dentry is renamed, the name and the parent dentry can both
+change so the hash will almost certainly change too.  This would move the
+dentry to a different chain in the hash table.  If a filename search
+happened to be looking at a dentry that was moved in this way,
+it might end up continuing the search down the wrong chain,
+and so miss out on part of the correct chain.
+
+The name-lookup process (`d_lookup()`) does _not_ try to prevent this
+from happening, but only to detect when it happens.
+`rename_lock` is a seqlock that is updated whenever any dentry is
+renamed.  If `d_lookup` finds that a rename happened while it
+unsuccessfully scanned a chain in the hash table, it simply tries
+again.
+
+### inode->i_mutex ###
+
+`i_mutex` is a mutex that serializes all changes to a particular
+directory.  This ensures that, for example, an `unlink()` and a `rename()`
+cannot both happen at the same time.  It also keeps the directory
+stable while the filesystem is asked to look up a name that is not
+currently in the dcache.
+
+This has a complementary role to that of `d_lock`: `i_mutex` on a
+directory protects all of the names in that directory, while `d_lock`
+on a name protects just one name in a directory.  Most changes to the
+dcache hold `i_mutex` on the relevant directory inode and briefly take
+`d_lock` on one or more the dentries while the change happens.  One
+exception is when idle dentries are removed from the dcache due to
+memory pressure.  This uses `d_lock`, but `i_mutex` plays no role.
+
+The mutex affects pathname lookup in two distinct ways.  Firstly it
+serializes lookup of a name in a directory.  `walk_component()` uses
+`lookup_fast()` first which, in turn, checks to see if the name is in the cache,
+using only `d_lock` locking.  If the name isn't found, then `walk_component()`
+falls back to `lookup_slow()` which takes `i_mutex`, checks again that
+the name isn't in the cache, and then calls in to the filesystem to get a
+definitive answer.  A new dentry will be added to the cache regardless of
+the result.
+
+Secondly, when pathname lookup reaches the final component, it will
+sometimes need to take `i_mutex` before performing the last lookup so
+that the required exclusion can be achieved.  How path lookup chooses
+to take, or not take, `i_mutex` is one of the
+issues addressed in a subsequent section.
+
+### mnt->mnt_count ###
+
+`mnt_count` is a per-CPU reference counter on "`mount`" structures.
+Per-CPU here means that incrementing the count is cheap as it only
+uses CPU-local memory, but checking if the count is zero is expensive as
+it needs to check with every CPU.  Taking a `mnt_count` reference
+prevents the mount structure from disappearing as the result of regular
+unmount operations, but does not prevent a "lazy" unmount.  So holding
+`mnt_count` doesn't ensure that the mount remains in the namespace and,
+in particular, doesn't stabilize the link to the mounted-on dentry.  It
+does, however, ensure that the `mount` data structure remains coherent,
+and it provides a reference to the root dentry of the mounted
+filesystem.  So a reference through `->mnt_count` provides a stable
+reference to the mounted dentry, but not the mounted-on dentry.
+
+### mount_lock ###
+
+`mount_lock` is a global seqlock, a bit like `rename_lock`.  It can be used to
+check if any change has been made to any mount points.
+
+While walking down the tree (away from the root) this lock is used when
+crossing a mount point to check that the crossing was safe.  That is,
+the value in the seqlock is read, then the code finds the mount that
+is mounted on the current directory, if there is one, and increments
+the `mnt_count`.  Finally the value in `mount_lock` is checked against
+the old value.  If there is no change, then the crossing was safe.  If there
+was a change, the `mnt_count` is decremented and the whole process is
+retried.
+
+When walking up the tree (towards the root) by following a ".." link,
+a little more care is needed.  In this case the seqlock (which
+contains both a counter and a spinlock) is fully locked to prevent
+any changes to any mount points while stepping up.  This locking is
+needed to stabilize the link to the mounted-on dentry, which the
+refcount on the mount itself doesn't ensure.
+
+### RCU ###
+
+Finally the global (but extremely lightweight) RCU read lock is held
+from time to time to ensure certain data structures don't get freed
+unexpectedly.
+
+In particular it is held while scanning chains in the dcache hash
+table, and the mount point hash table.
+
+Bringing it together with `struct nameidata`
+--------------------------------------------
+
+[First edition Unix]: http://minnie.tuhs.org/cgi-bin/utree.pl?file=V1/u2.s
+
+Throughout the process of walking a path, the current status is stored
+in a `struct nameidata`, "namei" being the traditional name - dating
+all the way back to [First Edition Unix] - of the function that
+converts a "name" to an "inode".  `struct nameidata` contains (among
+other fields):
+
+### `struct path path` ###
+
+A `path` contains a `struct vfsmount` (which is
+embedded in a `struct mount`) and a `struct dentry`.  Together these
+record the current status of the walk.  They start out referring to the
+starting point (the current working directory, the root directory, or some other
+directory identified by a file descriptor), and are updated on each
+step.  A reference through `d_lockref` and `mnt_count` is always
+held.
+
+### `struct qstr last` ###
+
+This is a string together with a length (i.e. _not_ `nul` terminated)
+that is the "next" component in the pathname.
+
+### `int last_type` ###
+
+This is one of `LAST_NORM`, `LAST_ROOT`, `LAST_DOT`, `LAST_DOTDOT`, or
+`LAST_BIND`.  The `last` field is only valid if the type is
+`LAST_NORM`.  `LAST_BIND` is used when following a symlink and no
+components of the symlink have been processed yet.  Others should be
+fairly self-explanatory.
+
+### `struct path root` ###
+
+This is used to hold a reference to the effective root of the
+filesystem.  Often that reference won't be needed, so this field is
+only assigned the first time it is used, or when a non-standard root
+is requested.  Keeping a reference in the `nameidata` ensures that
+only one root is in effect for the entire path walk, even if it races
+with a `chroot()` system call.
+
+The root is needed when either of two conditions holds: (1) either the
+pathname or a symbolic link starts with a "'/'", or (2) a "`..`"
+component is being handled, since "`..`" from the root must always stay
+at the root.  The value used is usually the current root directory of
+the calling process.  An alternate root can be provided as when
+`sysctl()` calls `file_open_root()`, and when NFSv4 or Btrfs call
+`mount_subtree()`.  In each case a pathname is being looked up in a very
+specific part of the filesystem, and the lookup must not be allowed to
+escape that subtree.  It works a bit like a local `chroot()`.
+
+Ignoring the handling of symbolic links, we can now describe the
+"`link_path_walk()`" function, which handles the lookup of everything
+except the final component as:
+
+>  Given a path (`name`) and a nameidata structure (`nd`), check that the
+>  current directory has execute permission and then advance `name`
+>  over one component while updating `last_type` and `last`.  If that
+>  was the final component, then return, otherwise call
+>  `walk_component()` and repeat from the top.
+
+`walk_component()` is even easier.  If the component is `LAST_DOTS`,
+it calls `handle_dots()` which does the necessary locking as already
+described.  If it finds a `LAST_NORM` component it first calls
+"`lookup_fast()`" which only looks in the dcache, but will ask the
+filesystem to revalidate the result if it is that sort of filesystem.
+If that doesn't get a good result, it calls "`lookup_slow()`" which
+takes the `i_mutex`, rechecks the cache, and then asks the filesystem
+to find a definitive answer.  Each of these will call
+`follow_managed()` (as described below) to handle any mount points.
+
+In the absence of symbolic links, `walk_component()` creates a new
+`struct path` containing a counted reference to the new dentry and a
+reference to the new `vfsmount` which is only counted if it is
+different from the previous `vfsmount`.  It then calls
+`path_to_nameidata()` to install the new `struct path` in the
+`struct nameidata` and drop the unneeded references.
+
+This "hand-over-hand" sequencing of getting a reference to the new
+dentry before dropping the reference to the previous dentry may
+seem obvious, but is worth pointing out so that we will recognize its
+analogue in the "RCU-walk" version.
+
+Handling the final component.
+-----------------------------
+
+`link_path_walk()` only walks as far as setting `nd->last` and
+`nd->last_type` to refer to the final component of the path.  It does
+not call `walk_component()` that last time.  Handling that final
+component remains for the caller to sort out. Those callers are
+`path_lookupat()`, `path_parentat()`, `path_mountpoint()` and
+`path_openat()` each of which handles the differing requirements of
+different system calls.
+
+`path_parentat()` is clearly the simplest - it just wraps a little bit
+of housekeeping around `link_path_walk()` and returns the parent
+directory and final component to the caller.  The caller will be either
+aiming to create a name (via `filename_create()`) or remove or rename
+a name (in which case `user_path_parent()` is used).  They will use
+`i_mutex` to exclude other changes while they validate and then
+perform their operation.
+
+`path_lookupat()` is nearly as simple - it is used when an existing
+object is wanted such as by `stat()` or `chmod()`.  It essentially just
+calls `walk_component()` on the final component through a call to
+`lookup_last()`.  `path_lookupat()` returns just the final dentry.
+
+`path_mountpoint()` handles the special case of unmounting which must
+not try to revalidate the mounted filesystem.  It effectively
+contains, through a call to `mountpoint_last()`, an alternate
+implementation of `lookup_slow()` which skips that step.  This is
+important when unmounting a filesystem that is inaccessible, such as
+one provided by a dead NFS server.
+
+Finally `path_openat()` is used for the `open()` system call; it
+contains, in support functions starting with "`do_last()`", all the
+complexity needed to handle the different subtleties of O_CREAT (with
+or without O_EXCL), final "`/`" characters, and trailing symbolic
+links.  We will revisit this in the final part of this series, which
+focuses on those symbolic links.  "`do_last()`" will sometimes, but
+not always, take `i_mutex`, depending on what it finds.
+
+Each of these, or the functions which call them, need to be alert to
+the possibility that the final component is not `LAST_NORM`.  If the
+goal of the lookup is to create something, then any value for
+`last_type` other than `LAST_NORM` will result in an error.  For
+example if `path_parentat()` reports `LAST_DOTDOT`, then the caller
+won't try to create that name.  They also check for trailing slashes
+by testing `last.name[last.len]`.  If there is any character beyond
+the final component, it must be a trailing slash.
+
+Revalidation and automounts
+---------------------------
+
+Apart from symbolic links, there are only two parts of the "REF-walk"
+process not yet covered.  One is the handling of stale cache entries
+and the other is automounts.
+
+On filesystems that require it, the lookup routines will call the
+`->d_revalidate()` dentry method to ensure that the cached information
+is current.  This will often confirm validity or update a few details
+from a server.  In some cases it may find that there has been change
+further up the path and that something that was thought to be valid
+previously isn't really.  When this happens the lookup of the whole
+path is aborted and retried with the "`LOOKUP_REVAL`" flag set.  This
+forces revalidation to be more thorough.  We will see more details of
+this retry process in the next article.
+
+Automount points are locations in the filesystem where an attempt to
+lookup a name can trigger changes to how that lookup should be
+handled, in particular by mounting a filesystem there.  These are
+covered in greater detail in autofs4.txt in the Linux documentation
+tree, but a few notes specifically related to path lookup are in order
+here.
+
+The Linux VFS has a concept of "managed" dentries which is reflected
+in function names such as "`follow_managed()`".  There are three
+potentially interesting things about these dentries corresponding
+to three different flags that might be set in `dentry->d_flags`:
+
+### `DCACHE_MANAGE_TRANSIT` ###
+
+If this flag has been set, then the filesystem has requested that the
+`d_manage()` dentry operation be called before handling any possible
+mount point.  This can perform two particular services:
+
+It can block to avoid races.  If an automount point is being
+unmounted, the `d_manage()` function will usually wait for that
+process to complete before letting the new lookup proceed and possibly
+trigger a new automount.
+
+It can selectively allow only some processes to transit through a
+mount point.  When a server process is managing automounts, it may
+need to access a directory without triggering normal automount
+processing.  That server process can identify itself to the `autofs`
+filesystem, which will then give it a special pass through
+`d_manage()` by returning `-EISDIR`.
+
+### `DCACHE_MOUNTED` ###
+
+This flag is set on every dentry that is mounted on.  As Linux
+supports multiple filesystem namespaces, it is possible that the
+dentry may not be mounted on in *this* namespace, just in some
+other.  So this flag is seen as a hint, not a promise.
+
+If this flag is set, and `d_manage()` didn't return `-EISDIR`,
+`lookup_mnt()` is called to examine the mount hash table (honoring the
+`mount_lock` described earlier) and possibly return a new `vfsmount`
+and a new `dentry` (both with counted references).
+
+### `DCACHE_NEED_AUTOMOUNT` ###
+
+If `d_manage()` allowed us to get this far, and `lookup_mnt()` didn't
+find a mount point, then this flag causes the `d_automount()` dentry
+operation to be called.
+
+The `d_automount()` operation can be arbitrarily complex and may
+communicate with server processes etc. but it should ultimately either
+report that there was an error, that there was nothing to mount, or
+should provide an updated `struct path` with new `dentry` and `vfsmount`.
+
+In the latter case, `finish_automount()` will be called to safely
+install the new mount point into the mount table.
+
+There is no new locking of import here and it is important that no
+locks (only counted references) are held over this processing due to
+the very real possibility of extended delays.
+This will become more important next time when we examine RCU-walk
+which is particularly sensitive to delays.
+
+RCU-walk - faster pathname lookup in Linux
+==========================================
+
+RCU-walk is another algorithm for performing pathname lookup in Linux.
+It is in many ways similar to REF-walk and the two share quite a bit
+of code.  The significant difference in RCU-walk is how it allows for
+the possibility of concurrent access.
+
+We noted that REF-walk is complex because there are numerous details
+and special cases.  RCU-walk reduces this complexity by simply
+refusing to handle a number of cases -- it instead falls back to
+REF-walk.  The difficulty with RCU-walk comes from a different
+direction: unfamiliarity.  The locking rules when depending on RCU are
+quite different from traditional locking, so we will spend a little extra
+time when we come to those.
+
+Clear demarcation of roles
+--------------------------
+
+The easiest way to manage concurrency is to forcibly stop any other
+thread from changing the data structures that a given thread is
+looking at.  In cases where no other thread would even think of
+changing the data and lots of different threads want to read at the
+same time, this can be very costly.  Even when using locks that permit
+multiple concurrent readers, the simple act of updating the count of
+the number of current readers can impose an unwanted cost.  So the
+goal when reading a shared data structure that no other process is
+changing is to avoid writing anything to memory at all.  Take no
+locks, increment no counts, leave no footprints.
+
+The REF-walk mechanism already described certainly doesn't follow this
+principle, but then it is really designed to work when there may well
+be other threads modifying the data.  RCU-walk, in contrast, is
+designed for the common situation where there are lots of frequent
+readers and only occasional writers.  This may not be common in all
+parts of the filesystem tree, but in many parts it will be.  For the
+other parts it is important that RCU-walk can quickly fall back to
+using REF-walk.
+
+Pathname lookup always starts in RCU-walk mode but only remains there
+as long as what it is looking for is in the cache and is stable.  It
+dances lightly down the cached filesystem image, leaving no footprints
+and carefully watching where it is, to be sure it doesn't trip.  If it
+notices that something has changed or is changing, or if something
+isn't in the cache, then it tries to stop gracefully and switch to
+REF-walk.
+
+This stopping requires getting a counted reference on the current
+`vfsmount` and `dentry`, and ensuring that these are still valid -
+that a path walk with REF-walk would have found the same entries.
+This is an invariant that RCU-walk must guarantee.  It can only make
+decisions, such as selecting the next step, that are decisions which
+REF-walk could also have made if it were walking down the tree at the
+same time.  If the graceful stop succeeds, the rest of the path is
+processed with the reliable, if slightly sluggish, REF-walk.  If
+RCU-walk finds it cannot stop gracefully, it simply gives up and
+restarts from the top with REF-walk.
+
+This pattern of "try RCU-walk, if that fails try REF-walk" can be
+clearly seen in functions like `filename_lookup()`,
+`filename_parentat()`, `filename_mountpoint()`,
+`do_filp_open()`, and `do_file_open_root()`.  These five
+correspond roughly to the four `path_`* functions we met earlier,
+each of which calls `link_path_walk()`.  The `path_*` functions are
+called using different mode flags until a mode is found which works.
+They are first called with `LOOKUP_RCU` set to request "RCU-walk".  If
+that fails with the error `ECHILD` they are called again with no
+special flag to request "REF-walk".  If either of those report the
+error `ESTALE` a final attempt is made with `LOOKUP_REVAL` set (and no
+`LOOKUP_RCU`) to ensure that entries found in the cache are forcibly
+revalidated - normally entries are only revalidated if the filesystem
+determines that they are too old to trust.
+
+The `LOOKUP_RCU` attempt may drop that flag internally and switch to
+REF-walk, but will never then try to switch back to RCU-walk.  Places
+that trip up RCU-walk are much more likely to be near the leaves and
+so it is very unlikely that there will be much, if any, benefit from
+switching back.
+
+RCU and seqlocks: fast and light
+--------------------------------
+
+RCU is, unsurprisingly, critical to RCU-walk mode.  The
+`rcu_read_lock()` is held for the entire time that RCU-walk is walking
+down a path.  The particular guarantee it provides is that the key
+data structures - dentries, inodes, super_blocks, and mounts - will
+not be freed while the lock is held.  They might be unlinked or
+invalidated in one way or another, but the memory will not be
+repurposed so values in various fields will still be meaningful.  This
+is the only guarantee that RCU provides; everything else is done using
+seqlocks.
+
+As we saw above, REF-walk holds a counted reference to the current
+dentry and the current vfsmount, and does not release those references
+before taking references to the "next" dentry or vfsmount.  It also
+sometimes takes the `d_lock` spinlock.  These references and locks are
+taken to prevent certain changes from happening.  RCU-walk must not
+take those references or locks and so cannot prevent such changes.
+Instead, it checks to see if a change has been made, and aborts or
+retries if it has.
+
+To preserve the invariant mentioned above (that RCU-walk may only make
+decisions that REF-walk could have made), it must make the checks at
+or near the same places that REF-walk holds the references.  So, when
+REF-walk increments a reference count or takes a spinlock, RCU-walk
+samples the status of a seqlock using `read_seqcount_begin()` or a
+similar function.  When REF-walk decrements the count or drops the
+lock, RCU-walk checks if the sampled status is still valid using
+`read_seqcount_retry()` or similar.
+
+However, there is a little bit more to seqlocks than that.  If
+RCU-walk accesses two different fields in a seqlock-protected
+structure, or accesses the same field twice, there is no a priori
+guarantee of any consistency between those accesses.  When consistency
+is needed - which it usually is - RCU-walk must take a copy and then
+use `read_seqcount_retry()` to validate that copy.
+
+`read_seqcount_retry()` not only checks the sequence number, but also
+imposes a memory barrier so that no memory-read instruction from
+*before* the call can be delayed until *after* the call, either by the
+CPU or by the compiler.  A simple example of this can be seen in
+`slow_dentry_cmp()` which, for filesystems which do not use simple
+byte-wise name equality, calls into the filesystem to compare a name
+against a dentry.  The length and name pointer are copied into local
+variables, then `read_seqcount_retry()` is called to confirm the two
+are consistent, and only then is `->d_compare()` called.  When
+standard filename comparison is used, `dentry_cmp()` is called
+instead.  Notably it does _not_ use `read_seqcount_retry()`, but
+instead has a large comment explaining why the consistency guarantee
+isn't necessary.  A subsequent `read_seqcount_retry()` will be
+sufficient to catch any problem that could occur at this point.
+
+With that little refresher on seqlocks out of the way we can look at
+the bigger picture of how RCU-walk uses seqlocks.
+
+### `mount_lock` and `nd->m_seq` ###
+
+We already met the `mount_lock` seqlock when REF-walk used it to
+ensure that crossing a mount point is performed safely.  RCU-walk uses
+it for that too, but for quite a bit more.
+
+Instead of taking a counted reference to each `vfsmount` as it
+descends the tree, RCU-walk samples the state of `mount_lock` at the
+start of the walk and stores this initial sequence number in the
+`struct nameidata` in the `m_seq` field.  This one lock and one
+sequence number are used to validate all accesses to all `vfsmounts`,
+and all mount point crossings.  As changes to the mount table are
+relatively rare, it is reasonable to fall back on REF-walk any time
+that any "mount" or "unmount" happens.
+
+`m_seq` is checked (using `read_seqretry()`) at the end of an RCU-walk
+sequence, whether switching to REF-walk for the rest of the path or
+when the end of the path is reached.  It is also checked when stepping
+down over a mount point (in `__follow_mount_rcu()`) or up (in
+`follow_dotdot_rcu()`).  If it is ever found to have changed, the
+whole RCU-walk sequence is aborted and the path is processed again by
+REF-walk.
+
+If RCU-walk finds that `mount_lock` hasn't changed then it can be sure
+that, had REF-walk taken counted references on each vfsmount, the
+results would have been the same.  This ensures the invariant holds,
+at least for vfsmount structures.
+
+### `dentry->d_seq` and `nd->seq`. ###
+
+In place of taking a count or lock on `d_reflock`, RCU-walk samples
+the per-dentry `d_seq` seqlock, and stores the sequence number in the
+`seq` field of the nameidata structure, so `nd->seq` should always be
+the current sequence number of `nd->dentry`.  This number needs to be
+revalidated after copying, and before using, the name, parent, or
+inode of the dentry.
+
+The handling of the name we have already looked at, and the parent is
+only accessed in `follow_dotdot_rcu()` which fairly trivially follows
+the required pattern, though it does so for three different cases.
+
+When not at a mount point, `d_parent` is followed and its `d_seq` is
+collected.  When we are at a mount point, we instead follow the
+`mnt->mnt_mountpoint` link to get a new dentry and collect its
+`d_seq`.  Then, after finally finding a `d_parent` to follow, we must
+check if we have landed on a mount point and, if so, must find that
+mount point and follow the `mnt->mnt_root` link.  This would imply a
+somewhat unusual, but certainly possible, circumstance where the
+starting point of the path lookup was in part of the filesystem that
+was mounted on, and so not visible from the root.
+
+The inode pointer, stored in `->d_inode`, is a little more
+interesting.  The inode will always need to be accessed at least
+twice, once to determine if it is NULL and once to verify access
+permissions.  Symlink handling requires a validated inode pointer too.
+Rather than revalidating on each access, a copy is made on the first
+access and it is stored in the `inode` field of `nameidata` from where
+it can be safely accessed without further validation.
+
+`lookup_fast()` is the only lookup routine that is used in RCU-mode,
+`lookup_slow()` being too slow and requiring locks.  It is in
+`lookup_fast()` that we find the important "hand over hand" tracking
+of the current dentry.
+
+The current `dentry` and current `seq` number are passed to
+`__d_lookup_rcu()` which, on success, returns a new `dentry` and a
+new `seq` number.  `lookup_fast()` then copies the inode pointer and
+revalidates the new `seq` number.  It then validates the old `dentry`
+with the old `seq` number one last time and only then continues.  This
+process of getting the `seq` number of the new dentry and then
+checking the `seq` number of the old exactly mirrors the process of
+getting a counted reference to the new dentry before dropping that for
+the old dentry which we saw in REF-walk.
+
+### No `inode->i_mutex` or even `rename_lock` ###
+
+A mutex is a fairly heavyweight lock that can only be taken when it is
+permissible to sleep.  As `rcu_read_lock()` forbids sleeping,
+`inode->i_mutex` plays no role in RCU-walk.  If some other thread does
+take `i_mutex` and modifies the directory in a way that RCU-walk needs
+to notice, the result will be either that RCU-walk fails to find the
+dentry that it is looking for, or it will find a dentry which
+`read_seqretry()` won't validate.  In either case it will drop down to
+REF-walk mode which can take whatever locks are needed.
+
+Though `rename_lock` could be used by RCU-walk as it doesn't require
+any sleeping, RCU-walk doesn't bother.  REF-walk uses `rename_lock` to
+protect against the possibility of hash chains in the dcache changing
+while they are being searched.  This can result in failing to find
+something that actually is there.  When RCU-walk fails to find
+something in the dentry cache, whether it is really there or not, it
+already drops down to REF-walk and tries again with appropriate
+locking.  This neatly handles all cases, so adding extra checks on
+rename_lock would bring no significant value.
+
+`unlazy walk()` and `complete_walk()`
+-------------------------------------
+
+That "dropping down to REF-walk" typically involves a call to
+`unlazy_walk()`, so named because "RCU-walk" is also sometimes
+referred to as "lazy walk".  `unlazy_walk()` is called when
+following the path down to the current vfsmount/dentry pair seems to
+have proceeded successfully, but the next step is problematic.  This
+can happen if the next name cannot be found in the dcache, if
+permission checking or name revalidation couldn't be achieved while
+the `rcu_read_lock()` is held (which forbids sleeping), if an
+automount point is found, or in a couple of cases involving symlinks.
+It is also called from `complete_walk()` when the lookup has reached
+the final component, or the very end of the path, depending on which
+particular flavor of lookup is used.
+
+Other reasons for dropping out of RCU-walk that do not trigger a call
+to `unlazy_walk()` are when some inconsistency is found that cannot be
+handled immediately, such as `mount_lock` or one of the `d_seq`
+seqlocks reporting a change.  In these cases the relevant function
+will return `-ECHILD` which will percolate up until it triggers a new
+attempt from the top using REF-walk.
+
+For those cases where `unlazy_walk()` is an option, it essentially
+takes a reference on each of the pointers that it holds (vfsmount,
+dentry, and possibly some symbolic links) and then verifies that the
+relevant seqlocks have not been changed.  If there have been changes,
+it, too, aborts with `-ECHILD`, otherwise the transition to REF-walk
+has been a success and the lookup process continues.
+
+Taking a reference on those pointers is not quite as simple as just
+incrementing a counter.  That works to take a second reference if you
+already have one (often indirectly through another object), but it
+isn't sufficient if you don't actually have a counted reference at
+all.  For `dentry->d_lockref`, it is safe to increment the reference
+counter to get a reference unless it has been explicitly marked as
+"dead" which involves setting the counter to `-128`.
+`lockref_get_not_dead()` achieves this.
+
+For `mnt->mnt_count` it is safe to take a reference as long as
+`mount_lock` is then used to validate the reference.  If that
+validation fails, it may *not* be safe to just drop that reference in
+the standard way of calling `mnt_put()` - an unmount may have
+progressed too far.  So the code in `legitimize_mnt()`, when it
+finds that the reference it got might not be safe, checks the
+`MNT_SYNC_UMOUNT` flag to determine if a simple `mnt_put()` is
+correct, or if it should just decrement the count and pretend none of
+this ever happened.
+
+Taking care in filesystems
+---------------------------
+
+RCU-walk depends almost entirely on cached information and often will
+not call into the filesystem at all.  However there are two places,
+besides the already-mentioned component-name comparison, where the
+file system might be included in RCU-walk, and it must know to be
+careful.
+
+If the filesystem has non-standard permission-checking requirements -
+such as a networked filesystem which may need to check with the server
+- the `i_op->permission` interface might be called during RCU-walk.
+In this case an extra "`MAY_NOT_BLOCK`" flag is passed so that it
+knows not to sleep, but to return `-ECHILD` if it cannot complete
+promptly.  `i_op->permission` is given the inode pointer, not the
+dentry, so it doesn't need to worry about further consistency checks.
+However if it accesses any other filesystem data structures, it must
+ensure they are safe to be accessed with only the `rcu_read_lock()`
+held.  This typically means they must be freed using `kfree_rcu()` or
+similar.
+
+[`READ_ONCE()`]: https://lwn.net/Articles/624126/
+
+If the filesystem may need to revalidate dcache entries, then
+`d_op->d_revalidate` may be called in RCU-walk too.  This interface
+*is* passed the dentry but does not have access to the `inode` or the
+`seq` number from the `nameidata`, so it needs to be extra careful
+when accessing fields in the dentry.  This "extra care" typically
+involves using `ACCESS_ONCE()` or the newer [`READ_ONCE()`] to access
+fields, and verifying the result is not NULL before using it.  This
+pattern can be see in `nfs_lookup_revalidate()`.
+
+A pair of patterns
+------------------
+
+In various places in the details of REF-walk and RCU-walk, and also in
+the big picture, there are a couple of related patterns that are worth
+being aware of.
+
+The first is "try quickly and check, if that fails try slowly".  We
+can see that in the high-level approach of first trying RCU-walk and
+then trying REF-walk, and in places where `unlazy_walk()` is used to
+switch to REF-walk for the rest of the path.  We also saw it earlier
+in `dget_parent()` when following a "`..`" link.  It tries a quick way
+to get a reference, then falls back to taking locks if needed.
+
+The second pattern is "try quickly and check, if that fails try
+again - repeatedly".  This is seen with the use of `rename_lock` and
+`mount_lock` in REF-walk.  RCU-walk doesn't make use of this pattern -
+if anything goes wrong it is much safer to just abort and try a more
+sedate approach.
+
+The emphasis here is "try quickly and check".  It should probably be
+"try quickly _and carefully,_ then check".  The fact that checking is
+needed is a reminder that the system is dynamic and only a limited
+number of things are safe at all.  The most likely cause of errors in
+this whole process is assuming something is safe when in reality it
+isn't.  Careful consideration of what exactly guarantees the safety of
+each access is sometimes necessary.
+
+A walk among the symlinks
+=========================
+
+There are several basic issues that we will examine to understand the
+handling of symbolic links:  the symlink stack, together with cache
+lifetimes, will help us understand the overall recursive handling of
+symlinks and lead to the special care needed for the final component.
+Then a consideration of access-time updates and summary of the various
+flags controlling lookup will finish the story.
+
+The symlink stack
+-----------------
+
+There are only two sorts of filesystem objects that can usefully
+appear in a path prior to the final component: directories and symlinks.
+Handling directories is quite straightforward: the new directory
+simply becomes the starting point at which to interpret the next
+component on the path.  Handling symbolic links requires a bit more
+work.
+
+Conceptually, symbolic links could be handled by editing the path.  If
+a component name refers to a symbolic link, then that component is
+replaced by the body of the link and, if that body starts with a '/',
+then all preceding parts of the path are discarded.  This is what the
+"`readlink -f`" command does, though it also edits out "`.`" and
+"`..`" components.
+
+Directly editing the path string is not really necessary when looking
+up a path, and discarding early components is pointless as they aren't
+looked at anyway.  Keeping track of all remaining components is
+important, but they can of course be kept separately; there is no need
+to concatenate them.  As one symlink may easily refer to another,
+which in turn can refer to a third, we may need to keep the remaining
+components of several paths, each to be processed when the preceding
+ones are completed.  These path remnants are kept on a stack of
+limited size.
+
+There are two reasons for placing limits on how many symlinks can
+occur in a single path lookup.  The most obvious is to avoid loops.
+If a symlink referred to itself either directly or through
+intermediaries, then following the symlink can never complete
+successfully - the error `ELOOP` must be returned.  Loops can be
+detected without imposing limits, but limits are the simplest solution
+and, given the second reason for restriction, quite sufficient.
+
+[outlined recently]: http://thread.gmane.org/gmane.linux.kernel/1934390/focus=1934550
+
+The second reason was [outlined recently] by Linus:
+
+>  Because it's a latency and DoS issue too. We need to react well to
+>  true loops, but also to "very deep" non-loops. It's not about memory
+>  use, it's about users triggering unreasonable CPU resources.
+
+Linux imposes a limit on the length of any pathname: `PATH_MAX`, which
+is 4096.  There are a number of reasons for this limit; not letting the
+kernel spend too much time on just one path is one of them.  With
+symbolic links you can effectively generate much longer paths so some
+sort of limit is needed for the same reason.  Linux imposes a limit of
+at most 40 symlinks in any one path lookup.  It previously imposed a
+further limit of eight on the maximum depth of recursion, but that was
+raised to 40 when a separate stack was implemented, so there is now
+just the one limit.
+
+The `nameidata` structure that we met in an earlier article contains a
+small stack that can be used to store the remaining part of up to two
+symlinks.  In many cases this will be sufficient.  If it isn't, a
+separate stack is allocated with room for 40 symlinks.  Pathname
+lookup will never exceed that stack as, once the 40th symlink is
+detected, an error is returned.
+
+It might seem that the name remnants are all that needs to be stored on
+this stack, but we need a bit more.  To see that, we need to move on to
+cache lifetimes.
+
+Storage and lifetime of cached symlinks
+---------------------------------------
+
+Like other filesystem resources, such as inodes and directory
+entries, symlinks are cached by Linux to avoid repeated costly access
+to external storage.  It is particularly important for RCU-walk to be
+able to find and temporarily hold onto these cached entries, so that
+it doesn't need to drop down into REF-walk.
+
+[object-oriented design pattern]: https://lwn.net/Articles/446317/
+
+While each filesystem is free to make its own choice, symlinks are
+typically stored in one of two places.  Short symlinks are often
+stored directly in the inode.  When a filesystem allocates a `struct
+inode` it typically allocates extra space to store private data (a
+common [object-oriented design pattern] in the kernel).  This will
+sometimes include space for a symlink.  The other common location is
+in the page cache, which normally stores the content of files.  The
+pathname in a symlink can be seen as the content of that symlink and
+can easily be stored in the page cache just like file content.
+
+When neither of these is suitable, the next most likely scenario is
+that the filesystem will allocate some temporary memory and copy or
+construct the symlink content into that memory whenever it is needed.
+
+When the symlink is stored in the inode, it has the same lifetime as
+the inode which, itself, is protected by RCU or by a counted reference
+on the dentry.  This means that the mechanisms that pathname lookup
+uses to access the dcache and icache (inode cache) safely are quite
+sufficient for accessing some cached symlinks safely.  In these cases,
+the `i_link` pointer in the inode is set to point to wherever the
+symlink is stored and it can be accessed directly whenever needed.
+
+When the symlink is stored in the page cache or elsewhere, the
+situation is not so straightforward.  A reference on a dentry or even
+on an inode does not imply any reference on cached pages of that
+inode, and even an `rcu_read_lock()` is not sufficient to ensure that
+a page will not disappear.  So for these symlinks the pathname lookup
+code needs to ask the filesystem to provide a stable reference and,
+significantly, needs to release that reference when it is finished
+with it.
+
+Taking a reference to a cache page is often possible even in RCU-walk
+mode.  It does require making changes to memory, which is best avoided,
+but that isn't necessarily a big cost and it is better than dropping
+out of RCU-walk mode completely.  Even filesystems that allocate
+space to copy the symlink into can use `GFP_ATOMIC` to often successfully
+allocate memory without the need to drop out of RCU-walk.  If a
+filesystem cannot successfully get a reference in RCU-walk mode, it
+must return `-ECHILD` and `unlazy_walk()` will be called to return to
+REF-walk mode in which the filesystem is allowed to sleep.
+
+The place for all this to happen is the `i_op->follow_link()` inode
+method.  In the present mainline code this is never actually called in
+RCU-walk mode as the rewrite is not quite complete.  It is likely that
+in a future release this method will be passed an `inode` pointer when
+called in RCU-walk mode so it both (1) knows to be careful, and (2) has the
+validated pointer.  Much like the `i_op->permission()` method we
+looked at previously, `->follow_link()` would need to be careful that
+all the data structures it references are safe to be accessed while
+holding no counted reference, only the RCU lock.  Though getting a
+reference with `->follow_link()` is not yet done in RCU-walk mode, the
+code is ready to release the reference when that does happen.
+
+This need to drop the reference to a symlink adds significant
+complexity.  It requires a reference to the inode so that the
+`i_op->put_link()` inode operation can be called.  In REF-walk, that
+reference is kept implicitly through a reference to the dentry, so
+keeping the `struct path` of the symlink is easiest.  For RCU-walk,
+the pointer to the inode is kept separately.  To allow switching from
+RCU-walk back to REF-walk in the middle of processing nested symlinks
+we also need the seq number for the dentry so we can confirm that
+switching back was safe.
+
+Finally, when providing a reference to a symlink, the filesystem also
+provides an opaque "cookie" that must be passed to `->put_link()` so that it
+knows what to free.  This might be the allocated memory area, or a
+pointer to the `struct page` in the page cache, or something else
+completely.  Only the filesystem knows what it is.
+
+In order for the reference to each symlink to be dropped when the walk completes,
+whether in RCU-walk or REF-walk, the symlink stack needs to contain,
+along with the path remnants:
+
+- the `struct path` to provide a reference to the inode in REF-walk
+- the `struct inode *` to provide a reference to the inode in RCU-walk
+- the `seq` to allow the path to be safely switched from RCU-walk to REF-walk
+- the `cookie` that tells `->put_path()` what to put.
+
+This means that each entry in the symlink stack needs to hold five
+pointers and an integer instead of just one pointer (the path
+remnant).  On a 64-bit system, this is about 40 bytes per entry;
+with 40 entries it adds up to 1600 bytes total, which is less than
+half a page.  So it might seem like a lot, but is by no means
+excessive.
+
+Note that, in a given stack frame, the path remnant (`name`) is not
+part of the symlink that the other fields refer to.  It is the remnant
+to be followed once that symlink has been fully parsed.
+
+Following the symlink
+---------------------
+
+The main loop in `link_path_walk()` iterates seamlessly over all
+components in the path and all of the non-final symlinks.  As symlinks
+are processed, the `name` pointer is adjusted to point to a new
+symlink, or is restored from the stack, so that much of the loop
+doesn't need to notice.  Getting this `name` variable on and off the
+stack is very straightforward; pushing and popping the references is
+a little more complex.
+
+When a symlink is found, `walk_component()` returns the value `1`
+(`0` is returned for any other sort of success, and a negative number
+is, as usual, an error indicator).  This causes `get_link()` to be
+called; it then gets the link from the filesystem.  Providing that
+operation is successful, the old path `name` is placed on the stack,
+and the new value is used as the `name` for a while.  When the end of
+the path is found (i.e. `*name` is `'\0'`) the old `name` is restored
+off the stack and path walking continues.
+
+Pushing and popping the reference pointers (inode, cookie, etc.) is more
+complex in part because of the desire to handle tail recursion.  When
+the last component of a symlink itself points to a symlink, we
+want to pop the symlink-just-completed off the stack before pushing
+the symlink-just-found to avoid leaving empty path remnants that would
+just get in the way.
+
+It is most convenient to push the new symlink references onto the
+stack in `walk_component()` immediately when the symlink is found;
+`walk_component()` is also the last piece of code that needs to look at the
+old symlink as it walks that last component.  So it is quite
+convenient for `walk_component()` to release the old symlink and pop
+the references just before pushing the reference information for the
+new symlink.  It is guided in this by two flags; `WALK_GET`, which
+gives it permission to follow a symlink if it finds one, and
+`WALK_PUT`, which tells it to release the current symlink after it has been
+followed.  `WALK_PUT` is tested first, leading to a call to
+`put_link()`.  `WALK_GET` is tested subsequently (by
+`should_follow_link()`) leading to a call to `pick_link()` which sets
+up the stack frame.
+
+### Symlinks with no final component ###
+
+A pair of special-case symlinks deserve a little further explanation.
+Both result in a new `struct path` (with mount and dentry) being set
+up in the `nameidata`, and result in `get_link()` returning `NULL`.
+
+The more obvious case is a symlink to "`/`".  All symlinks starting
+with "`/`" are detected in `get_link()` which resets the `nameidata`
+to point to the effective filesystem root.  If the symlink only
+contains "`/`" then there is nothing more to do, no components at all,
+so `NULL` is returned to indicate that the symlink can be released and
+the stack frame discarded.
+
+The other case involves things in `/proc` that look like symlinks but
+aren't really.
+
+>     $ ls -l /proc/self/fd/1
+>     lrwx------ 1 neilb neilb 64 Jun 13 10:19 /proc/self/fd/1 -> /dev/pts/4
+
+Every open file descriptor in any process is represented in `/proc` by
+something that looks like a symlink.  It is really a reference to the
+target file, not just the name of it.  When you `readlink` these
+objects you get a name that might refer to the same file - unless it
+has been unlinked or mounted over.  When `walk_component()` follows
+one of these, the `->follow_link()` method in "procfs" doesn't return
+a string name, but instead calls `nd_jump_link()` which updates the
+`nameidata` in place to point to that target.  `->follow_link()` then
+returns `NULL`.  Again there is no final component and `get_link()`
+reports this by leaving the `last_type` field of `nameidata` as
+`LAST_BIND`.
+
+Following the symlink in the final component
+--------------------------------------------
+
+All this leads to `link_path_walk()` walking down every component, and
+following all symbolic links it finds, until it reaches the final
+component.  This is just returned in the `last` field of `nameidata`.
+For some callers, this is all they need; they want to create that
+`last` name if it doesn't exist or give an error if it does.  Other
+callers will want to follow a symlink if one is found, and possibly
+apply special handling to the last component of that symlink, rather
+than just the last component of the original file name.  These callers
+potentially need to call `link_path_walk()` again and again on
+successive symlinks until one is found that doesn't point to another
+symlink.
+
+This case is handled by the relevant caller of `link_path_walk()`, such as
+`path_lookupat()` using a loop that calls `link_path_walk()`, and then
+handles the final component.  If the final component is a symlink
+that needs to be followed, then `trailing_symlink()` is called to set
+things up properly and the loop repeats, calling `link_path_walk()`
+again.  This could loop as many as 40 times if the last component of
+each symlink is another symlink.
+
+The various functions that examine the final component and possibly
+report that it is a symlink are `lookup_last()`, `mountpoint_last()`
+and `do_last()`, each of which use the same convention as
+`walk_component()` of returning `1` if a symlink was found that needs
+to be followed.
+
+Of these, `do_last()` is the most interesting as it is used for
+opening a file.  Part of `do_last()` runs with `i_mutex` held and this
+part is in a separate function: `lookup_open()`.
+
+Explaining `do_last()` completely is beyond the scope of this article,
+but a few highlights should help those interested in exploring the
+code.
+
+1. Rather than just finding the target file, `do_last()` needs to open
+ it.  If the file was found in the dcache, then `vfs_open()` is used for
+ this.  If not, then `lookup_open()` will either call `atomic_open()` (if
+ the filesystem provides it) to combine the final lookup with the open, or
+ will perform the separate `lookup_real()` and `vfs_create()` steps
+ directly.  In the later case the actual "open" of this newly found or
+ created file will be performed by `vfs_open()`, just as if the name
+ were found in the dcache.
+
+2. `vfs_open()` can fail with `-EOPENSTALE` if the cached information
+ wasn't quite current enough.  Rather than restarting the lookup from
+ the top with `LOOKUP_REVAL` set, `lookup_open()` is called instead,
+ giving the filesystem a chance to resolve small inconsistencies.
+ If that doesn't work, only then is the lookup restarted from the top.
+
+3. An open with O_CREAT **does** follow a symlink in the final component,
+     unlike other creation system calls (like `mkdir`).  So the sequence:
+
+     >     ln -s bar /tmp/foo
+     >     echo hello > /tmp/foo
+
+     will create a file called `/tmp/bar`.  This is not permitted if
+     `O_EXCL` is set but otherwise is handled for an O_CREAT open much
+     like for a non-creating open: `should_follow_link()` returns `1`, and
+     so does `do_last()` so that `trailing_symlink()` gets called and the
+     open process continues on the symlink that was found.
+
+Updating the access time
+------------------------
+
+We previously said of RCU-walk that it would "take no locks, increment
+no counts, leave no footprints."  We have since seen that some
+"footprints" can be needed when handling symlinks as a counted
+reference (or even a memory allocation) may be needed.  But these
+footprints are best kept to a minimum.
+
+One other place where walking down a symlink can involve leaving
+footprints in a way that doesn't affect directories is in updating access times.
+In Unix (and Linux) every filesystem object has a "last accessed
+time", or "`atime`".  Passing through a directory to access a file
+within is not considered to be an access for the purposes of
+`atime`; only listing the contents of a directory can update its `atime`.
+Symlinks are different it seems.  Both reading a symlink (with `readlink()`)
+and looking up a symlink on the way to some other destination can
+update the atime on that symlink.
+
+[clearest statement]: http://pubs.opengroup.org/onlinepubs/9699919799/basedefs/V1_chap04.html#tag_04_08
+
+It is not clear why this is the case; POSIX has little to say on the
+subject.  The [clearest statement] is that, if a particular implementation
+updates a timestamp in a place not specified by POSIX, this must be
+documented "except that any changes caused by pathname resolution need
+not be documented".  This seems to imply that POSIX doesn't really
+care about access-time updates during pathname lookup.
+
+[Linux 1.3.87]: https://git.kernel.org/cgit/linux/kernel/git/history/history.git/diff/fs/ext2/symlink.c?id=f806c6db77b8eaa6e00dcfb6b567706feae8dbb8
+
+An examination of history shows that prior to [Linux 1.3.87], the ext2
+filesystem, at least, didn't update atime when following a link.
+Unfortunately we have no record of why that behavior was changed.
+
+In any case, access time must now be updated and that operation can be
+quite complex.  Trying to stay in RCU-walk while doing it is best
+avoided.  Fortunately it is often permitted to skip the `atime`
+update.  Because `atime` updates cause performance problems in various
+areas, Linux supports the `relatime` mount option, which generally
+limits the updates of `atime` to once per day on files that aren't
+being changed (and symlinks never change once created).  Even without
+`relatime`, many filesystems record `atime` with a one-second
+granularity, so only one update per second is required.
+
+It is easy to test if an `atime` update is needed while in RCU-walk
+mode and, if it isn't, the update can be skipped and RCU-walk mode
+continues.  Only when an `atime` update is actually required does the
+path walk drop down to REF-walk.  All of this is handled in the
+`get_link()` function.
+
+A few flags
+-----------
+
+A suitable way to wrap up this tour of pathname walking is to list
+the various flags that can be stored in the `nameidata` to guide the
+lookup process.  Many of these are only meaningful on the final
+component, others reflect the current state of the pathname lookup.
+And then there is `LOOKUP_EMPTY`, which doesn't fit conceptually with
+the others.  If this is not set, an empty pathname causes an error
+very early on.  If it is set, empty pathnames are not considered to be
+an error.
+
+### Global state flags ###
+
+We have already met two global state flags: `LOOKUP_RCU` and
+`LOOKUP_REVAL`.  These select between one of three overall approaches
+to lookup: RCU-walk, REF-walk, and REF-walk with forced revalidation.
+
+`LOOKUP_PARENT` indicates that the final component hasn't been reached
+yet.  This is primarily used to tell the audit subsystem the full
+context of a particular access being audited.
+
+`LOOKUP_ROOT` indicates that the `root` field in the `nameidata` was
+provided by the caller, so it shouldn't be released when it is no
+longer needed.
+
+`LOOKUP_JUMPED` means that the current dentry was chosen not because
+it had the right name but for some other reason.  This happens when
+following "`..`", following a symlink to `/`, crossing a mount point
+or accessing a "`/proc/$PID/fd/$FD`" symlink.  In this case the
+filesystem has not been asked to revalidate the name (with
+`d_revalidate()`).  In such cases the inode may still need to be
+revalidated, so `d_op->d_weak_revalidate()` is called if
+`LOOKUP_JUMPED` is set when the look completes - which may be at the
+final component or, when creating, unlinking, or renaming, at the penultimate component.
+
+### Final-component flags ###
+
+Some of these flags are only set when the final component is being
+considered.  Others are only checked for when considering that final
+component.
+
+`LOOKUP_AUTOMOUNT` ensures that, if the final component is an automount
+point, then the mount is triggered.  Some operations would trigger it
+anyway, but operations like `stat()` deliberately don't.  `statfs()`
+needs to trigger the mount but otherwise behaves a lot like `stat()`, so
+it sets `LOOKUP_AUTOMOUNT`, as does "`quotactl()`" and the handling of
+"`mount --bind`".
+
+`LOOKUP_FOLLOW` has a similar function to `LOOKUP_AUTOMOUNT` but for
+symlinks.  Some system calls set or clear it implicitly, while
+others have API flags such as `AT_SYMLINK_FOLLOW` and
+`UMOUNT_NOFOLLOW` to control it.  Its effect is similar to
+`WALK_GET` that we already met, but it is used in a different way.
+
+`LOOKUP_DIRECTORY` insists that the final component is a directory.
+Various callers set this and it is also set when the final component
+is found to be followed by a slash.
+
+Finally `LOOKUP_OPEN`, `LOOKUP_CREATE`, `LOOKUP_EXCL`, and
+`LOOKUP_RENAME_TARGET` are not used directly by the VFS but are made
+available to the filesystem and particularly the `->d_revalidate()`
+method.  A filesystem can choose not to bother revalidating too hard
+if it knows that it will be asked to open or create the file soon.
+These flags were previously useful for `->lookup()` too but with the
+introduction of `->atomic_open()` they are less relevant there.
+
+End of the road
+---------------
+
+Despite its complexity, all this pathname lookup code appears to be
+in good shape - various parts are certainly easier to understand now
+than even a couple of releases ago.  But that doesn't mean it is
+"finished".   As already mentioned, RCU-walk currently only follows
+symlinks that are stored in the inode so, while it handles many ext4
+symlinks, it doesn't help with NFS, XFS, or Btrfs.  That support
+is not likely to be long delayed.
diff --git a/Documentation/filesystems/path-lookup.txt b/Documentation/filesystems/path-lookup.txt
index 3571667c7..9b8930f58 100644
--- a/Documentation/filesystems/path-lookup.txt
+++ b/Documentation/filesystems/path-lookup.txt
@@ -379,4 +379,4 @@ Papers and other documentation on dcache locking
 
 2. http://lse.sourceforge.net/locking/dcache/dcache.html
 
-
+3. path-lookup.md in this directory.
diff --git a/Documentation/filesystems/proc.txt b/Documentation/filesystems/proc.txt
index 3a9d65c91..402ab99e4 100644
--- a/Documentation/filesystems/proc.txt
+++ b/Documentation/filesystems/proc.txt
@@ -175,6 +175,7 @@ read the file /proc/PID/status:
   VmLib:      1412 kB
   VmPTE:        20 kb
   VmSwap:        0 kB
+  HugetlbPages:          0 kB
   Threads:        1
   SigQ:   0/28578
   SigPnd: 0000000000000000
@@ -238,6 +239,7 @@ Table 1-2: Contents of the status files (as of 4.1)
  VmPTE                       size of page table entries
  VmPMD                       size of second level page tables
  VmSwap                      size of swap usage (the number of referred swapents)
+ HugetlbPages                size of hugetlb memory portions
  Threads                     number of threads
  SigQ                        number of signals queued/max. number for queue
  SigPnd                      bitmap of pending signals for the thread
@@ -424,12 +426,15 @@ Private_Clean:         0 kB
 Private_Dirty:         0 kB
 Referenced:          892 kB
 Anonymous:             0 kB
+AnonHugePages:         0 kB
+Shared_Hugetlb:        0 kB
+Private_Hugetlb:       0 kB
 Swap:                  0 kB
 SwapPss:               0 kB
 KernelPageSize:        4 kB
 MMUPageSize:           4 kB
-Locked:              374 kB
-VmFlags: rd ex mr mw me de
+Locked:                0 kB
+VmFlags: rd ex mr mw me dw
 
 the first of these lines shows the same information as is displayed for the
 mapping in /proc/PID/maps.  The remaining lines show the size of the mapping
@@ -449,9 +454,14 @@ accessed.
 "Anonymous" shows the amount of memory that does not belong to any file.  Even
 a mapping associated with a file may contain anonymous pages: when MAP_PRIVATE
 and a page is modified, the file page is replaced by a private anonymous copy.
-"Swap" shows how much would-be-anonymous memory is also used, but out on
-swap.
+"AnonHugePages" shows the ammount of memory backed by transparent hugepage.
+"Shared_Hugetlb" and "Private_Hugetlb" show the ammounts of memory backed by
+hugetlbfs page which is *not* counted in "RSS" or "PSS" field for historical
+reasons. And these are not included in {Shared,Private}_{Clean,Dirty} field.
+"Swap" shows how much would-be-anonymous memory is also used, but out on swap.
 "SwapPss" shows proportional swap share of this mapping.
+"Locked" indicates whether the mapping is locked in memory or not.
+
 "VmFlags" field deserves a separate description. This member represents the kernel
 flags associated with the particular virtual memory area in two letter encoded
 manner. The codes are the following:
@@ -475,7 +485,6 @@ manner. The codes are the following:
     ac  - area is accountable
     nr  - swap space is not reserved for the area
     ht  - area uses huge tlb pages
-    nl  - non-linear mapping
     ar  - architecture specific flag
     dd  - do not include area into core dump
     sd  - soft-dirty flag
@@ -815,9 +824,6 @@ varies by architecture and compile options.  The following is from a
 
 > cat /proc/meminfo
 
-The "Locked" indicates whether the mapping is locked in memory or not.
-
-
 MemTotal:     16344972 kB
 MemFree:      13634064 kB
 MemAvailable: 14836172 kB
@@ -1599,16 +1605,16 @@ Documentation/accounting.
 ---------------------------------------------------------------
 When a process is dumped, all anonymous memory is written to a core file as
 long as the size of the core file isn't limited. But sometimes we don't want
-to dump some memory segments, for example, huge shared memory. Conversely,
-sometimes we want to save file-backed memory segments into a core file, not
-only the individual files.
+to dump some memory segments, for example, huge shared memory or DAX.
+Conversely, sometimes we want to save file-backed memory segments into a core
+file, not only the individual files.
 
 /proc/<pid>/coredump_filter allows you to customize which memory segments
 will be dumped when the <pid> process is dumped. coredump_filter is a bitmask
 of memory types. If a bit of the bitmask is set, memory segments of the
 corresponding memory type are dumped, otherwise they are not dumped.
 
-The following 7 memory types are supported:
+The following 9 memory types are supported:
   - (bit 0) anonymous private memory
   - (bit 1) anonymous shared memory
   - (bit 2) file-backed private memory
@@ -1617,20 +1623,22 @@ The following 7 memory types are supported:
             effective only if the bit 2 is cleared)
   - (bit 5) hugetlb private memory
   - (bit 6) hugetlb shared memory
+  - (bit 7) DAX private memory
+  - (bit 8) DAX shared memory
 
   Note that MMIO pages such as frame buffer are never dumped and vDSO pages
   are always dumped regardless of the bitmask status.
 
-  Note bit 0-4 doesn't effect any hugetlb memory. hugetlb memory are only
-  effected by bit 5-6.
+  Note that bits 0-4 don't affect hugetlb or DAX memory. hugetlb memory is
+  only affected by bit 5-6, and DAX is only affected by bits 7-8.
 
-Default value of coredump_filter is 0x23; this means all anonymous memory
-segments and hugetlb private memory are dumped.
+The default value of coredump_filter is 0x33; this means all anonymous memory
+segments, ELF header pages and hugetlb private memory are dumped.
 
 If you don't want to dump all shared memory segments attached to pid 1234,
-write 0x21 to the process's proc file.
+write 0x31 to the process's proc file.
 
-  $ echo 0x21 > /proc/1234/coredump_filter
+  $ echo 0x31 > /proc/1234/coredump_filter
 
 When a new process is created, the process inherits the bitmask status from its
 parent. It is useful to set up coredump_filter before the program runs.
diff --git a/Documentation/filesystems/sysfs-tagging.txt b/Documentation/filesystems/sysfs-tagging.txt
index eb843e49c..c7c8e6438 100644
--- a/Documentation/filesystems/sysfs-tagging.txt
+++ b/Documentation/filesystems/sysfs-tagging.txt
@@ -17,13 +17,13 @@ the sysfs directory entries we ensure that we don't have conflicts
 in the directories and applications only see a limited set of
 the network devices.
 
-Each sysfs directory entry may be tagged with zero or one
-namespaces.  A sysfs_dirent is augmented with a void *s_ns.  If a
-directory entry is tagged, then sysfs_dirent->s_flags will have a
-flag between KOBJ_NS_TYPE_NONE and KOBJ_NS_TYPES, and s_ns will
-point to the namespace to which it belongs.
+Each sysfs directory entry may be tagged with a namespace via the
+void *ns member of its kernfs_node.  If a directory entry is tagged,
+then kernfs_node->flags will have a flag between KOBJ_NS_TYPE_NONE
+and KOBJ_NS_TYPES, and ns will point to the namespace to which it
+belongs.
 
-Each sysfs superblock's sysfs_super_info contains an array void
+Each sysfs superblock's kernfs_super_info contains an array void
 *ns[KOBJ_NS_TYPES].  When a task in a tagging namespace
 kobj_nstype first mounts sysfs, a new superblock is created.  It
 will be differentiated from other sysfs mounts by having its
@@ -31,7 +31,7 @@ s_fs_info->ns[kobj_nstype] set to the new namespace.  Note that
 through bind mounting and mounts propagation, a task can easily view
 the contents of other namespaces' sysfs mounts.  Therefore, when a
 namespace exits, it will call kobj_ns_exit() to invalidate any
-sysfs_dirent->s_ns pointers pointing to it.
+kernfs_node->ns pointers pointing to it.
 
 Users of this interface:
 - define a type in the kobj_ns_type enumeration.
diff --git a/Documentation/filesystems/sysfs.txt b/Documentation/filesystems/sysfs.txt
index 9494afb94..24da7b32c 100644
--- a/Documentation/filesystems/sysfs.txt
+++ b/Documentation/filesystems/sysfs.txt
@@ -40,7 +40,7 @@ ancestors of object hierarchies; i.e. the subsystems the objects
 belong to. 
 
 Sysfs internally stores a pointer to the kobject that implements a
-directory in the sysfs_dirent object associated with the directory. In
+directory in the kernfs_node object associated with the directory. In
 the past this kobject pointer has been used by sysfs to do reference
 counting directly on the kobject whenever the file is opened or closed.
 With the current sysfs implementation the kobject reference count is
@@ -191,9 +191,10 @@ implementations:
   be called again, rearmed, to fill the buffer.
 
 - On write(2), sysfs expects the entire buffer to be passed during the
-  first write. Sysfs then passes the entire buffer to the store()
-  method. 
-  
+  first write. Sysfs then passes the entire buffer to the store() method.
+  A terminating null is added after the data on stores. This makes
+  functions like sysfs_streq() safe to use.
+
   When writing sysfs files, userspace processes should first read the
   entire file, modify the values it wishes to change, then write the
   entire buffer back.