Merge branch 'mm-rst' into docs-next

Mike Rapoport says:

  These patches convert files in Documentation/vm to ReST format, add an
  initial index and link it to the top level documentation.

  There are no contents changes in the documentation, except few spelling
  fixes. The relatively large diffstat stems from the indentation and
  paragraph wrapping changes.

  I've tried to keep the formatting as consistent as possible, but I could
  miss some places that needed markup and add some markup where it was not
  necessary.

[jc: significant conflicts in vm/hmm.rst]

Documentation/ABI/stable/sysfs-devices-node

@@ -90,4 +90,4 @@ Date:		December 2009
 Contact:	Lee Schermerhorn <lee.schermerhorn@hp.com>
 Description:
 		The node's huge page size control/query attributes.
-		See Documentation/vm/hugetlbpage.txt
+		See Documentation/vm/hugetlbpage.rst
\ No newline at end of file

Documentation/ABI/testing/sysfs-kernel-mm-hugepages

@@ -12,4 +12,4 @@ Description:
 			free_hugepages
 			surplus_hugepages
 			resv_hugepages
-		See Documentation/vm/hugetlbpage.txt for details.
+		See Documentation/vm/hugetlbpage.rst for details.

Documentation/ABI/testing/sysfs-kernel-mm-ksm

@@ -40,7 +40,7 @@ Description:	Kernel Samepage Merging daemon sysfs interface
 		sleep_millisecs: how many milliseconds ksm should sleep between
 		scans.
 
-		See Documentation/vm/ksm.txt for more information.
+		See Documentation/vm/ksm.rst for more information.
 
 What:		/sys/kernel/mm/ksm/merge_across_nodes
 Date:		January 2013

Documentation/ABI/testing/sysfs-kernel-slab

@@ -37,7 +37,7 @@ Description:
 		The alloc_calls file is read-only and lists the kernel code
 		locations from which allocations for this cache were performed.
 		The alloc_calls file only contains information if debugging is
-		enabled for that cache (see Documentation/vm/slub.txt).
+		enabled for that cache (see Documentation/vm/slub.rst).
 
 What:		/sys/kernel/slab/cache/alloc_fastpath
 Date:		February 2008
@@ -219,7 +219,7 @@ Contact:	Pekka Enberg <penberg@cs.helsinki.fi>,
 Description:
 		The free_calls file is read-only and lists the locations of
 		object frees if slab debugging is enabled (see
-		Documentation/vm/slub.txt).
+		Documentation/vm/slub.rst).
 
 What:		/sys/kernel/slab/cache/free_fastpath
 Date:		February 2008

Documentation/admin-guide/kernel-parameters.txt

@@ -3915,7 +3915,7 @@
 			cache (risks via metadata attacks are mostly
 			unchanged). Debug options disable merging on their
 			own.
-			For more information see Documentation/vm/slub.txt.
+			For more information see Documentation/vm/slub.rst.
 
 	slab_max_order=	[MM, SLAB]
 			Determines the maximum allowed order for slabs.
@@ -3929,7 +3929,7 @@
 			slub_debug can create guard zones around objects and
 			may poison objects when not in use. Also tracks the
 			last alloc / free. For more information see
-			Documentation/vm/slub.txt.
+			Documentation/vm/slub.rst.
 
 	slub_memcg_sysfs=	[MM, SLUB]
 			Determines whether to enable sysfs directories for
@@ -3943,7 +3943,7 @@
 			Determines the maximum allowed order for slabs.
 			A high setting may cause OOMs due to memory
 			fragmentation. For more information see
-			Documentation/vm/slub.txt.
+			Documentation/vm/slub.rst.
 
 	slub_min_objects=	[MM, SLUB]
 			The minimum number of objects per slab. SLUB will
@@ -3952,12 +3952,12 @@
 			the number of objects indicated. The higher the number
 			of objects the smaller the overhead of tracking slabs
 			and the less frequently locks need to be acquired.
-			For more information see Documentation/vm/slub.txt.
+			For more information see Documentation/vm/slub.rst.
 
 	slub_min_order=	[MM, SLUB]
 			Determines the minimum page order for slabs. Must be
 			lower than slub_max_order.
-			For more information see Documentation/vm/slub.txt.
+			For more information see Documentation/vm/slub.rst.
 
 	slub_nomerge	[MM, SLUB]
 			Same with slab_nomerge. This is supported for legacy.
@@ -4313,7 +4313,7 @@
 			Format: [always|madvise|never]
 			Can be used to control the default behavior of the system
 			with respect to transparent hugepages.
-			See Documentation/vm/transhuge.txt for more details.
+			See Documentation/vm/transhuge.rst for more details.
 
 	tsc=		Disable clocksource stability checks for TSC.
 			Format: <string>

Documentation/dev-tools/kasan.rst

@@ -120,7 +120,7 @@ A typical out of bounds access report looks like this::
 
 The header of the report discribe what kind of bug happened and what kind of
 access caused it. It's followed by the description of the accessed slub object
-(see 'SLUB Debug output' section in Documentation/vm/slub.txt for details) and
+(see 'SLUB Debug output' section in Documentation/vm/slub.rst for details) and
 the description of the accessed memory page.
 
 In the last section the report shows memory state around the accessed address.

Documentation/filesystems/proc.txt

@@ -515,7 +515,7 @@ guarantees:
 
 The /proc/PID/clear_refs is used to reset the PG_Referenced and ACCESSED/YOUNG
 bits on both physical and virtual pages associated with a process, and the
-soft-dirty bit on pte (see Documentation/vm/soft-dirty.txt for details).
+soft-dirty bit on pte (see Documentation/vm/soft-dirty.rst for details).
 To clear the bits for all the pages associated with the process
     > echo 1 > /proc/PID/clear_refs
 
@@ -536,7 +536,7 @@ Any other value written to /proc/PID/clear_refs will have no effect.
 
 The /proc/pid/pagemap gives the PFN, which can be used to find the pageflags
 using /proc/kpageflags and number of times a page is mapped using
-/proc/kpagecount. For detailed explanation, see Documentation/vm/pagemap.txt.
+/proc/kpagecount. For detailed explanation, see Documentation/vm/pagemap.rst.
 
 The /proc/pid/numa_maps is an extension based on maps, showing the memory
 locality and binding policy, as well as the memory usage (in pages) of

Documentation/filesystems/tmpfs.txt

@@ -105,7 +105,7 @@ policy for the file will revert to "default" policy.
 NUMA memory allocation policies have optional flags that can be used in
 conjunction with their modes.  These optional flags can be specified
 when tmpfs is mounted by appending them to the mode before the NodeList.
-See Documentation/vm/numa_memory_policy.txt for a list of all available
+See Documentation/vm/numa_memory_policy.rst for a list of all available
 memory allocation policy mode flags and their effect on memory policy.
 
 	=static		is equivalent to	MPOL_F_STATIC_NODES

Documentation/index.rst

@@ -45,7 +45,7 @@ the kernel interface as seen by application developers.
 .. toctree::
    :maxdepth: 2
 
-   userspace-api/index	      
+   userspace-api/index
 
 
 Introduction to kernel development
@@ -89,6 +89,7 @@ needed).
    sound/index
    crypto/index
    filesystems/index
+   vm/index
 
 Architecture-specific documentation
 -----------------------------------

Documentation/sysctl/vm.txt

@@ -515,7 +515,7 @@ nr_hugepages
 
 Change the minimum size of the hugepage pool.
 
-See Documentation/vm/hugetlbpage.txt
+See Documentation/vm/hugetlbpage.rst
 
 ==============================================================
 
@@ -524,7 +524,7 @@ nr_overcommit_hugepages
 Change the maximum size of the hugepage pool. The maximum is
 nr_hugepages + nr_overcommit_hugepages.
 
-See Documentation/vm/hugetlbpage.txt
+See Documentation/vm/hugetlbpage.rst
 
 ==============================================================
 
@@ -667,7 +667,7 @@ and don't use much of it.
 
 The default value is 0.
 
-See Documentation/vm/overcommit-accounting and
+See Documentation/vm/overcommit-accounting.rst and
 mm/mmap.c::__vm_enough_memory() for more information.
 
 ==============================================================

Documentation/vm/00-INDEX

 00-INDEX
 	- this file.
-active_mm.txt
+active_mm.rst
 	- An explanation from Linus about tsk->active_mm vs tsk->mm.
-balance
+balance.rst
 	- various information on memory balancing.
-cleancache.txt
+cleancache.rst
 	- Intro to cleancache and page-granularity victim cache.
-frontswap.txt
+frontswap.rst
 	- Outline frontswap, part of the transcendent memory frontend.
-highmem.txt
+highmem.rst
 	- Outline of highmem and common issues.
-hmm.txt
+hmm.rst
 	- Documentation of heterogeneous memory management
-hugetlbpage.txt
+hugetlbpage.rst
 	- a brief summary of hugetlbpage support in the Linux kernel.
-hugetlbfs_reserv.txt
+hugetlbfs_reserv.rst
 	- A brief overview of hugetlbfs reservation design/implementation.
-hwpoison.txt
+hwpoison.rst
 	- explains what hwpoison is
-idle_page_tracking.txt
+idle_page_tracking.rst
 	- description of the idle page tracking feature.
-ksm.txt
+ksm.rst
 	- how to use the Kernel Samepage Merging feature.
-mmu_notifier.txt
+mmu_notifier.rst
 	- a note about clearing pte/pmd and mmu notifications
-numa
+numa.rst
 	- information about NUMA specific code in the Linux vm.
-numa_memory_policy.txt
+numa_memory_policy.rst
 	- documentation of concepts and APIs of the 2.6 memory policy support.
-overcommit-accounting
+overcommit-accounting.rst
 	- description of the Linux kernels overcommit handling modes.
-page_frags
+page_frags.rst
 	- description of page fragments allocator
-page_migration
+page_migration.rst
 	- description of page migration in NUMA systems.
-pagemap.txt
+pagemap.rst
 	- pagemap, from the userspace perspective
-page_owner.txt
+page_owner.rst
 	- tracking about who allocated each page
-remap_file_pages.txt
+remap_file_pages.rst
 	- a note about remap_file_pages() system call
-slub.txt
+slub.rst
 	- a short users guide for SLUB.
-soft-dirty.txt
+soft-dirty.rst
 	- short explanation for soft-dirty PTEs
-split_page_table_lock
+split_page_table_lock.rst
 	- Separate per-table lock to improve scalability of the old page_table_lock.
-swap_numa.txt
+swap_numa.rst
 	- automatic binding of swap device to numa node
-transhuge.txt
+transhuge.rst
 	- Transparent Hugepage Support, alternative way of using hugepages.
-unevictable-lru.txt
+unevictable-lru.rst
 	- Unevictable LRU infrastructure
-userfaultfd.txt
+userfaultfd.rst
 	- description of userfaultfd system call
 z3fold.txt
 	- outline of z3fold allocator for storing compressed pages
-zsmalloc.txt
+zsmalloc.rst
 	- outline of zsmalloc allocator for storing compressed pages
-zswap.txt
+zswap.rst
 	- Intro to compressed cache for swap pages

Documentation/vm/active_mm.rst

+.. _active_mm:
+
+=========
+Active MM
+=========
+
+::
+
+ List:       linux-kernel
+ Subject:    Re: active_mm
+ From:       Linus Torvalds <torvalds () transmeta ! com>
+ Date:       1999-07-30 21:36:24
+
+ Cc'd to linux-kernel, because I don't write explanations all that often,
+ and when I do I feel better about more people reading them.
+
+ On Fri, 30 Jul 1999, David Mosberger wrote:
+ >
+ > Is there a brief description someplace on how "mm" vs. "active_mm" in
+ > the task_struct are supposed to be used?  (My apologies if this was
+ > discussed on the mailing lists---I just returned from vacation and
+ > wasn't able to follow linux-kernel for a while).
+
+ Basically, the new setup is:
+
+  - we have "real address spaces" and "anonymous address spaces". The
+    difference is that an anonymous address space doesn't care about the
+    user-level page tables at all, so when we do a context switch into an
+    anonymous address space we just leave the previous address space
+    active.
+
+    The obvious use for a "anonymous address space" is any thread that
+    doesn't need any user mappings - all kernel threads basically fall into
+    this category, but even "real" threads can temporarily say that for
+    some amount of time they are not going to be interested in user space,
+    and that the scheduler might as well try to avoid wasting time on
+    switching the VM state around. Currently only the old-style bdflush
+    sync does that.
+
+  - "tsk->mm" points to the "real address space". For an anonymous process,
+    tsk->mm will be NULL, for the logical reason that an anonymous process
+    really doesn't _have_ a real address space at all.
+
+  - however, we obviously need to keep track of which address space we
+    "stole" for such an anonymous user. For that, we have "tsk->active_mm",
+    which shows what the currently active address space is.
+
+    The rule is that for a process with a real address space (ie tsk->mm is
+    non-NULL) the active_mm obviously always has to be the same as the real
+    one.
+
+    For a anonymous process, tsk->mm == NULL, and tsk->active_mm is the
+    "borrowed" mm while the anonymous process is running. When the
+    anonymous process gets scheduled away, the borrowed address space is
+    returned and cleared.
+
+ To support all that, the "struct mm_struct" now has two counters: a
+ "mm_users" counter that is how many "real address space users" there are,
+ and a "mm_count" counter that is the number of "lazy" users (ie anonymous
+ users) plus one if there are any real users.
+
+ Usually there is at least one real user, but it could be that the real
+ user exited on another CPU while a lazy user was still active, so you do
+ actually get cases where you have a address space that is _only_ used by
+ lazy users. That is often a short-lived state, because once that thread
+ gets scheduled away in favour of a real thread, the "zombie" mm gets
+ released because "mm_users" becomes zero.
+
+ Also, a new rule is that _nobody_ ever has "init_mm" as a real MM any
+ more. "init_mm" should be considered just a "lazy context when no other
+ context is available", and in fact it is mainly used just at bootup when
+ no real VM has yet been created. So code that used to check
+
+ 	if (current->mm == &init_mm)
+
+ should generally just do
+
+ 	if (!current->mm)
+
+ instead (which makes more sense anyway - the test is basically one of "do
+ we have a user context", and is generally done by the page fault handler
+ and things like that).
+
+ Anyway, I put a pre-patch-2.3.13-1 on ftp.kernel.org just a moment ago,
+ because it slightly changes the interfaces to accommodate the alpha (who
+ would have thought it, but the alpha actually ends up having one of the
+ ugliest context switch codes - unlike the other architectures where the MM
+ and register state is separate, the alpha PALcode joins the two, and you
+ need to switch both together).
+
+ (From http://marc.info/?l=linux-kernel&m=93337278602211&w=2)

Documentation/vm/active_mm.txt

-List:       linux-kernel
-Subject:    Re: active_mm
-From:       Linus Torvalds <torvalds () transmeta ! com>
-Date:       1999-07-30 21:36:24
-
-Cc'd to linux-kernel, because I don't write explanations all that often,
-and when I do I feel better about more people reading them.
-
-On Fri, 30 Jul 1999, David Mosberger wrote:
->
-> Is there a brief description someplace on how "mm" vs. "active_mm" in
-> the task_struct are supposed to be used?  (My apologies if this was
-> discussed on the mailing lists---I just returned from vacation and
-> wasn't able to follow linux-kernel for a while).
-
-Basically, the new setup is:
-
- - we have "real address spaces" and "anonymous address spaces". The
-   difference is that an anonymous address space doesn't care about the
-   user-level page tables at all, so when we do a context switch into an
-   anonymous address space we just leave the previous address space
-   active.
-
-   The obvious use for a "anonymous address space" is any thread that
-   doesn't need any user mappings - all kernel threads basically fall into
-   this category, but even "real" threads can temporarily say that for
-   some amount of time they are not going to be interested in user space,
-   and that the scheduler might as well try to avoid wasting time on
-   switching the VM state around. Currently only the old-style bdflush
-   sync does that.
-
- - "tsk->mm" points to the "real address space". For an anonymous process,
-   tsk->mm will be NULL, for the logical reason that an anonymous process
-   really doesn't _have_ a real address space at all.
-
- - however, we obviously need to keep track of which address space we
-   "stole" for such an anonymous user. For that, we have "tsk->active_mm",
-   which shows what the currently active address space is.
-
-   The rule is that for a process with a real address space (ie tsk->mm is
-   non-NULL) the active_mm obviously always has to be the same as the real
-   one.
-
-   For a anonymous process, tsk->mm == NULL, and tsk->active_mm is the
-   "borrowed" mm while the anonymous process is running. When the
-   anonymous process gets scheduled away, the borrowed address space is
-   returned and cleared.
-
-To support all that, the "struct mm_struct" now has two counters: a
-"mm_users" counter that is how many "real address space users" there are,
-and a "mm_count" counter that is the number of "lazy" users (ie anonymous
-users) plus one if there are any real users.
-
-Usually there is at least one real user, but it could be that the real
-user exited on another CPU while a lazy user was still active, so you do
-actually get cases where you have a address space that is _only_ used by
-lazy users. That is often a short-lived state, because once that thread
-gets scheduled away in favour of a real thread, the "zombie" mm gets
-released because "mm_users" becomes zero.
-
-Also, a new rule is that _nobody_ ever has "init_mm" as a real MM any
-more. "init_mm" should be considered just a "lazy context when no other
-context is available", and in fact it is mainly used just at bootup when
-no real VM has yet been created. So code that used to check
-
-	if (current->mm == &init_mm)
-
-should generally just do
-
-	if (!current->mm)
-
-instead (which makes more sense anyway - the test is basically one of "do
-we have a user context", and is generally done by the page fault handler
-and things like that).
-
-Anyway, I put a pre-patch-2.3.13-1 on ftp.kernel.org just a moment ago,
-because it slightly changes the interfaces to accommodate the alpha (who
-would have thought it, but the alpha actually ends up having one of the
-ugliest context switch codes - unlike the other architectures where the MM
-and register state is separate, the alpha PALcode joins the two, and you
-need to switch both together).
-
-(From http://marc.info/?l=linux-kernel&m=93337278602211&w=2)

Documentation/vm/balance → Documentation/vm/balance.rst

+.. _balance:
+
+================
+Memory Balancing
+================
+
 Started Jan 2000 by Kanoj Sarcar <kanoj@sgi.com>
 
 Memory balancing is needed for !__GFP_ATOMIC and !__GFP_KSWAPD_RECLAIM as
@@ -62,11 +68,11 @@ for non-sleepable allocations. Second, the HIGHMEM zone is also balanced,
 so as to give a fighting chance for replace_with_highmem() to get a
 HIGHMEM page, as well as to ensure that HIGHMEM allocations do not
 fall back into regular zone. This also makes sure that HIGHMEM pages
-are not leaked (for example, in situations where a HIGHMEM page is in 
+are not leaked (for example, in situations where a HIGHMEM page is in
 the swapcache but is not being used by anyone)
 
 kswapd also needs to know about the zones it should balance. kswapd is
-primarily needed in a situation where balancing can not be done, 
+primarily needed in a situation where balancing can not be done,
 probably because all allocation requests are coming from intr context
 and all process contexts are sleeping. For 2.3, kswapd does not really
 need to balance the highmem zone, since intr context does not request
@@ -89,7 +95,8 @@ pages is below watermark[WMARK_LOW]; in which case zone_wake_kswapd is also set.
 
 
 (Good) Ideas that I have heard:
+
 1. Dynamic experience should influence balancing: number of failed requests
-for a zone can be tracked and fed into the balancing scheme (jalvo@mbay.net)
+   for a zone can be tracked and fed into the balancing scheme (jalvo@mbay.net)
 2. Implement a replace_with_highmem()-like replace_with_regular() to preserve
-dma pages. (lkd@tantalophile.demon.co.uk)
+   dma pages. (lkd@tantalophile.demon.co.uk)

Documentation/vm/cleancache.txt → Documentation/vm/cleancache.rst

-MOTIVATION
+.. _cleancache:
+
+==========
+Cleancache
+==========
+
+Motivation
+==========
 
 Cleancache is a new optional feature provided by the VFS layer that
 potentially dramatically increases page cache effectiveness for
@@ -21,9 +28,10 @@ Transcendent memory "drivers" for cleancache are currently implemented
 in Xen (using hypervisor memory) and zcache (using in-kernel compressed
 memory) and other implementations are in development.
 
-FAQs are included below.
+:ref:`FAQs <faq>` are included below.
 
-IMPLEMENTATION OVERVIEW
+Implementation Overview
+=======================
 
 A cleancache "backend" that provides transcendent memory registers itself
 to the kernel's cleancache "frontend" by calling cleancache_register_ops,
@@ -80,22 +88,33 @@ different Linux threads are simultaneously putting and invalidating a page
 with the same handle, the results are indeterminate.  Callers must
 lock the page to ensure serial behavior.
 
-CLEANCACHE PERFORMANCE METRICS
+Cleancache Performance Metrics
+==============================
 
 If properly configured, monitoring of cleancache is done via debugfs in
-the /sys/kernel/debug/cleancache directory.  The effectiveness of cleancache
+the `/sys/kernel/debug/cleancache` directory.  The effectiveness of cleancache
 can be measured (across all filesystems) with:
 
-succ_gets	- number of gets that were successful
-failed_gets	- number of gets that failed
-puts		- number of puts attempted (all "succeed")
-invalidates	- number of invalidates attempted
+``succ_gets``
+	number of gets that were successful
+
+``failed_gets``
+	number of gets that failed
+
+``puts``
+	number of puts attempted (all "succeed")
+
+``invalidates``
+	number of invalidates attempted
 
 A backend implementation may provide additional metrics.
 
+.. _faq:
+
 FAQ
+===
 
-1) Where's the value? (Andrew Morton)
+* Where's the value? (Andrew Morton)
 
 Cleancache provides a significant performance benefit to many workloads
 in many environments with negligible overhead by improving the
@@ -137,8 +156,8 @@ device that stores pages of data in a compressed state.  And
 the proposed "RAMster" driver shares RAM across multiple physical
 systems.
 
-2) Why does cleancache have its sticky fingers so deep inside the
-   filesystems and VFS? (Andrew Morton and Christoph Hellwig)
+* Why does cleancache have its sticky fingers so deep inside the
+  filesystems and VFS? (Andrew Morton and Christoph Hellwig)
 
 The core hooks for cleancache in VFS are in most cases a single line
 and the minimum set are placed precisely where needed to maintain
@@ -168,9 +187,9 @@ filesystems in the future.
 The total impact of the hooks to existing fs and mm files is only
 about 40 lines added (not counting comments and blank lines).
 
-3) Why not make cleancache asynchronous and batched so it can
-   more easily interface with real devices with DMA instead
-   of copying each individual page? (Minchan Kim)
+* Why not make cleancache asynchronous and batched so it can more
+  easily interface with real devices with DMA instead of copying each
+  individual page? (Minchan Kim)
 
 The one-page-at-a-time copy semantics simplifies the implementation
 on both the frontend and backend and also allows the backend to
@@ -182,8 +201,8 @@ are avoided.  While the interface seems odd for a "real device"
 or for real kernel-addressable RAM, it makes perfect sense for
 transcendent memory.
 
-4) Why is non-shared cleancache "exclusive"?  And where is the
-   page "invalidated" after a "get"? (Minchan Kim)
+* Why is non-shared cleancache "exclusive"?  And where is the
+  page "invalidated" after a "get"? (Minchan Kim)
 
 The main reason is to free up space in transcendent memory and
 to avoid unnecessary cleancache_invalidate calls.  If you want inclusive,
@@ -193,7 +212,7 @@ be easily extended to add a "get_no_invalidate" call.
 
 The invalidate is done by the cleancache backend implementation.
 
-5) What's the performance impact?
+* What's the performance impact?
 
 Performance analysis has been presented at OLS'09 and LCA'10.
 Briefly, performance gains can be significant on most workloads,
@@ -206,7 +225,7 @@ single-core systems with slow memory-copy speeds, cleancache
 has little value, but in newer multicore machines, especially
 consolidated/virtualized machines, it has great value.
 
-6) How do I add cleancache support for filesystem X? (Boaz Harrash)
+* How do I add cleancache support for filesystem X? (Boaz Harrash)
 
 Filesystems that are well-behaved and conform to certain
 restrictions can utilize cleancache simply by making a call to
@@ -217,26 +236,26 @@ not enable the optional cleancache.
 
 Some points for a filesystem to consider:
 
-- The FS should be block-device-based (e.g. a ram-based FS such
-  as tmpfs should not enable cleancache)
-- To ensure coherency/correctness, the FS must ensure that all
-  file removal or truncation operations either go through VFS or
-  add hooks to do the equivalent cleancache "invalidate" operations
-- To ensure coherency/correctness, either inode numbers must
-  be unique across the lifetime of the on-disk file OR the
-  FS must provide an "encode_fh" function.
-- The FS must call the VFS superblock alloc and deactivate routines
-  or add hooks to do the equivalent cleancache calls done there.
-- To maximize performance, all pages fetched from the FS should
-  go through the do_mpag_readpage routine or the FS should add
-  hooks to do the equivalent (cf. btrfs)
-- Currently, the FS blocksize must be the same as PAGESIZE.  This
-  is not an architectural restriction, but no backends currently
-  support anything different.
-- A clustered FS should invoke the "shared_init_fs" cleancache
-  hook to get best performance for some backends.
-
-7) Why not use the KVA of the inode as the key? (Christoph Hellwig)
+  - The FS should be block-device-based (e.g. a ram-based FS such
+    as tmpfs should not enable cleancache)
+  - To ensure coherency/correctness, the FS must ensure that all
+    file removal or truncation operations either go through VFS or
+    add hooks to do the equivalent cleancache "invalidate" operations
+  - To ensure coherency/correctness, either inode numbers must
+    be unique across the lifetime of the on-disk file OR the
+    FS must provide an "encode_fh" function.
+  - The FS must call the VFS superblock alloc and deactivate routines
+    or add hooks to do the equivalent cleancache calls done there.
+  - To maximize performance, all pages fetched from the FS should
+    go through the do_mpag_readpage routine or the FS should add
+    hooks to do the equivalent (cf. btrfs)
+  - Currently, the FS blocksize must be the same as PAGESIZE.  This
+    is not an architectural restriction, but no backends currently
+    support anything different.
+  - A clustered FS should invoke the "shared_init_fs" cleancache
+    hook to get best performance for some backends.
+
+* Why not use the KVA of the inode as the key? (Christoph Hellwig)
 
 If cleancache would use the inode virtual address instead of
 inode/filehandle, the pool id could be eliminated.  But, this
@@ -251,7 +270,7 @@ of cleancache would be lost because the cache of pages in cleanache
 is potentially much larger than the kernel pagecache and is most
 useful if the pages survive inode cache removal.
 
-8) Why is a global variable required?
+* Why is a global variable required?
 
 The cleancache_enabled flag is checked in all of the frequently-used
 cleancache hooks.  The alternative is a function call to check a static
@@ -262,14 +281,14 @@ global variable allows cleancache to be enabled by default at compile
 time, but have insignificant performance impact when cleancache remains
 disabled at runtime.
 
-9) Does cleanache work with KVM?
+* Does cleanache work with KVM?
 
 The memory model of KVM is sufficiently different that a cleancache
 backend may have less value for KVM.  This remains to be tested,
 especially in an overcommitted system.
 
-10) Does cleancache work in userspace?  It sounds useful for
-   memory hungry caches like web browsers.  (Jamie Lokier)
+* Does cleancache work in userspace?  It sounds useful for
+  memory hungry caches like web browsers.  (Jamie Lokier)
 
 No plans yet, though we agree it sounds useful, at least for
 apps that bypass the page cache (e.g. O_DIRECT).

Documentation/vm/conf.py

+# -*- coding: utf-8; mode: python -*-
+
+project = "Linux Memory Management Documentation"
+
+tags.add("subproject")
+
+latex_documents = [
+    ('index', 'memory-management.tex', project,
+     'The kernel development community', 'manual'),
+]

Documentation/vm/frontswap.txt → Documentation/vm/frontswap.rst

+.. _frontswap:
+
+=========
+Frontswap
+=========
+
 Frontswap provides a "transcendent memory" interface for swap pages.
 In some environments, dramatic performance savings may be obtained because
 swapped pages are saved in RAM (or a RAM-like device) instead of a swap disk.
 
-(Note, frontswap -- and cleancache (merged at 3.0) -- are the "frontends"
+(Note, frontswap -- and :ref:`cleancache` (merged at 3.0) -- are the "frontends"
 and the only necessary changes to the core kernel for transcendent memory;
 all other supporting code -- the "backends" -- is implemented as drivers.
-See the LWN.net article "Transcendent memory in a nutshell" for a detailed
-overview of frontswap and related kernel parts:
-https://lwn.net/Articles/454795/ )
+See the LWN.net article `Transcendent memory in a nutshell`_
+for a detailed overview of frontswap and related kernel parts)
+
+.. _Transcendent memory in a nutshell: https://lwn.net/Articles/454795/
 
 Frontswap is so named because it can be thought of as the opposite of
 a "backing" store for a swap device.  The storage is assumed to be
@@ -50,19 +57,27 @@ or the store fails AND the page is invalidated.  This ensures stale data may
 never be obtained from frontswap.
 
 If properly configured, monitoring of frontswap is done via debugfs in
-the /sys/kernel/debug/frontswap directory.  The effectiveness of
+the `/sys/kernel/debug/frontswap` directory.  The effectiveness of
 frontswap can be measured (across all swap devices) with:
 
-failed_stores	- how many store attempts have failed
-loads		- how many loads were attempted (all should succeed)
-succ_stores	- how many store attempts have succeeded
-invalidates	- how many invalidates were attempted
+``failed_stores``
+	how many store attempts have failed
+
+``loads``
+	how many loads were attempted (all should succeed)
+
+``succ_stores``
+	how many store attempts have succeeded
+
+``invalidates``
+	how many invalidates were attempted
 
 A backend implementation may provide additional metrics.
 
 FAQ
+===
 
-1) Where's the value?
+* Where's the value?
 
 When a workload starts swapping, performance falls through the floor.
 Frontswap significantly increases performance in many such workloads by
@@ -117,8 +132,8 @@ A KVM implementation is underway and has been RFC'ed to lkml.  And,
 using frontswap, investigation is also underway on the use of NVM as
 a memory extension technology.
 
-2) Sure there may be performance advantages in some situations, but
-   what's the space/time overhead of frontswap?
+* Sure there may be performance advantages in some situations, but
+  what's the space/time overhead of frontswap?
 
 If CONFIG_FRONTSWAP is disabled, every frontswap hook compiles into
 nothingness and the only overhead is a few extra bytes per swapon'ed
@@ -148,8 +163,8 @@ pressure that can potentially outweigh the other advantages.  A
 backend, such as zcache, must implement policies to carefully (but
 dynamically) manage memory limits to ensure this doesn't happen.
 
-3) OK, how about a quick overview of what this frontswap patch does
-   in terms that a kernel hacker can grok?
+* OK, how about a quick overview of what this frontswap patch does
+  in terms that a kernel hacker can grok?
 
 Let's assume that a frontswap "backend" has registered during
 kernel initialization; this registration indicates that this
@@ -188,9 +203,9 @@ and (potentially) a swap device write are replaced by a "frontswap backend
 store" and (possibly) a "frontswap backend loads", which are presumably much
 faster.
 
-4) Can't frontswap be configured as a "special" swap device that is
-   just higher priority than any real swap device (e.g. like zswap,
-   or maybe swap-over-nbd/NFS)?
+* Can't frontswap be configured as a "special" swap device that is
+  just higher priority than any real swap device (e.g. like zswap,
+  or maybe swap-over-nbd/NFS)?
 
 No.  First, the existing swap subsystem doesn't allow for any kind of
 swap hierarchy.  Perhaps it could be rewritten to accommodate a hierarchy,
@@ -240,9 +255,9 @@ installation, frontswap is useless.  Swapless portable devices
 can still use frontswap but a backend for such devices must configure
 some kind of "ghost" swap device and ensure that it is never used.
 
-5) Why this weird definition about "duplicate stores"?  If a page
-   has been previously successfully stored, can't it always be
-   successfully overwritten?
+* Why this weird definition about "duplicate stores"?  If a page
+  has been previously successfully stored, can't it always be
+  successfully overwritten?
 
 Nearly always it can, but no, sometimes it cannot.  Consider an example
 where data is compressed and the original 4K page has been compressed
@@ -254,7 +269,7 @@ the old data and ensure that it is no longer accessible.  Since the
 swap subsystem then writes the new data to the read swap device,
 this is the correct course of action to ensure coherency.
 
-6) What is frontswap_shrink for?
+* What is frontswap_shrink for?
 
 When the (non-frontswap) swap subsystem swaps out a page to a real
 swap device, that page is only taking up low-value pre-allocated disk
@@ -267,7 +282,7 @@ to "repatriate" pages sent to a remote machine back to the local machine;
 this is driven using the frontswap_shrink mechanism when memory pressure
 subsides.
 
-7) Why does the frontswap patch create the new include file swapfile.h?
+* Why does the frontswap patch create the new include file swapfile.h?
 
 The frontswap code depends on some swap-subsystem-internal data
 structures that have, over the years, moved back and forth between

Documentation/vm/highmem.txt → Documentation/vm/highmem.rst

+.. _highmem:
 
-			     ====================
-			     HIGH MEMORY HANDLING
-			     ====================
+====================
+High Memory Handling
+====================
 
 By: Peter Zijlstra <a.p.zijlstra@chello.nl>
 
-Contents:
-
- (*) What is high memory?
-
- (*) Temporary virtual mappings.
-
- (*) Using kmap_atomic.
-
- (*) Cost of temporary mappings.
-
- (*) i386 PAE.
+.. contents:: :local:
 
-
-====================
-WHAT IS HIGH MEMORY?
+What Is High Memory?
 ====================
 
 High memory (highmem) is used when the size of physical memory approaches or
@@ -38,7 +27,7 @@ kernel entry/exit.  This means the available virtual memory space (4GiB on
 i386) has to be divided between user and kernel space.
 
 The traditional split for architectures using this approach is 3:1, 3GiB for
-userspace and the top 1GiB for kernel space:
+userspace and the top 1GiB for kernel space::
 
 		+--------+ 0xffffffff
 		| Kernel |
@@ -58,40 +47,38 @@ and user maps.  Some hardware (like some ARMs), however, have limited virtual
 space when they use mm context tags.
 
 
-==========================
-TEMPORARY VIRTUAL MAPPINGS
+Temporary Virtual Mappings
 ==========================
 
 The kernel contains several ways of creating temporary mappings:
 
- (*) vmap().  This can be used to make a long duration mapping of multiple
-     physical pages into a contiguous virtual space.  It needs global
-     synchronization to unmap.
+* vmap().  This can be used to make a long duration mapping of multiple
+  physical pages into a contiguous virtual space.  It needs global
+  synchronization to unmap.
 
- (*) kmap().  This permits a short duration mapping of a single page.  It needs
-     global synchronization, but is amortized somewhat.  It is also prone to
-     deadlocks when using in a nested fashion, and so it is not recommended for
-     new code.
+* kmap().  This permits a short duration mapping of a single page.  It needs
+  global synchronization, but is amortized somewhat.  It is also prone to
+  deadlocks when using in a nested fashion, and so it is not recommended for
+  new code.
 
- (*) kmap_atomic().  This permits a very short duration mapping of a single
-     page.  Since the mapping is restricted to the CPU that issued it, it
-     performs well, but the issuing task is therefore required to stay on that
-     CPU until it has finished, lest some other task displace its mappings.
+* kmap_atomic().  This permits a very short duration mapping of a single
+  page.  Since the mapping is restricted to the CPU that issued it, it
+  performs well, but the issuing task is therefore required to stay on that
+  CPU until it has finished, lest some other task displace its mappings.
 
-     kmap_atomic() may also be used by interrupt contexts, since it is does not
-     sleep and the caller may not sleep until after kunmap_atomic() is called.
+  kmap_atomic() may also be used by interrupt contexts, since it is does not
+  sleep and the caller may not sleep until after kunmap_atomic() is called.
 
-     It may be assumed that k[un]map_atomic() won't fail.
+  It may be assumed that k[un]map_atomic() won't fail.
 
 
-=================
-USING KMAP_ATOMIC
+Using kmap_atomic
 =================
 
 When and where to use kmap_atomic() is straightforward.  It is used when code
 wants to access the contents of a page that might be allocated from high memory
 (see __GFP_HIGHMEM), for example a page in the pagecache.  The API has two
-functions, and they can be used in a manner similar to the following:
+functions, and they can be used in a manner similar to the following::
 
 	/* Find the page of interest. */
 	struct page *page = find_get_page(mapping, offset);
@@ -109,7 +96,7 @@ Note that the kunmap_atomic() call takes the result of the kmap_atomic() call
 not the argument.
 
 If you need to map two pages because you want to copy from one page to
-another you need to keep the kmap_atomic calls strictly nested, like:
+another you need to keep the kmap_atomic calls strictly nested, like::
 
 	vaddr1 = kmap_atomic(page1);
 	vaddr2 = kmap_atomic(page2);
@@ -120,8 +107,7 @@ another you need to keep the kmap_atomic calls strictly nested, like:
 	kunmap_atomic(vaddr1);
 
 
-==========================
-COST OF TEMPORARY MAPPINGS
+Cost of Temporary Mappings
 ==========================
 
 The cost of creating temporary mappings can be quite high.  The arch has to
@@ -136,25 +122,24 @@ If CONFIG_MMU is not set, then there can be no temporary mappings and no
 highmem.  In such a case, the arithmetic approach will also be used.
 
 
-========
 i386 PAE
 ========
 
 The i386 arch, under some circumstances, will permit you to stick up to 64GiB
 of RAM into your 32-bit machine.  This has a number of consequences:
 
- (*) Linux needs a page-frame structure for each page in the system and the
-     pageframes need to live in the permanent mapping, which means:
+* Linux needs a page-frame structure for each page in the system and the
+  pageframes need to live in the permanent mapping, which means:
 
- (*) you can have 896M/sizeof(struct page) page-frames at most; with struct
-     page being 32-bytes that would end up being something in the order of 112G
-     worth of pages; the kernel, however, needs to store more than just
-     page-frames in that memory...
+* you can have 896M/sizeof(struct page) page-frames at most; with struct
+  page being 32-bytes that would end up being something in the order of 112G
+  worth of pages; the kernel, however, needs to store more than just
+  page-frames in that memory...
 
- (*) PAE makes your page tables larger - which slows the system down as more
-     data has to be accessed to traverse in TLB fills and the like.  One
-     advantage is that PAE has more PTE bits and can provide advanced features
-     like NX and PAT.
+* PAE makes your page tables larger - which slows the system down as more
+  data has to be accessed to traverse in TLB fills and the like.  One
+  advantage is that PAE has more PTE bits and can provide advanced features
+  like NX and PAT.
 
 The general recommendation is that you don't use more than 8GiB on a 32-bit
 machine - although more might work for you and your workload, you're pretty

Documentation/vm/hmm.txt → Documentation/vm/hmm.rst

+.. hmm:
+
+=====================================
 Heterogeneous Memory Management (HMM)
+=====================================
 
 Provide infrastructure and helpers to integrate non-conventional memory (device
 memory like GPU on board memory) into regular kernel path, with the cornerstone
@@ -6,10 +10,10 @@ of this being specialized struct page for such memory (see sections 5 to 7 of
 this document).
 
 HMM also provides optional helpers for SVM (Share Virtual Memory), i.e.,
-allowing a device to transparently access program address coherently with the
-CPU meaning that any valid pointer on the CPU is also a valid pointer for the
-device. This is becoming mandatory to simplify the use of advanced hetero-
-geneous computing where GPU, DSP, or FPGA are used to perform various
+allowing a device to transparently access program address coherently with
+the CPU meaning that any valid pointer on the CPU is also a valid pointer
+for the device. This is becoming mandatory to simplify the use of advanced
+heterogeneous computing where GPU, DSP, or FPGA are used to perform various
 computations on behalf of a process.
 
 This document is divided as follows: in the first section I expose the problems
@@ -21,19 +25,10 @@ fifth section deals with how device memory is represented inside the kernel.
 Finally, the last section presents a new migration helper that allows lever-
 aging the device DMA engine.
 
+.. contents:: :local:
 
-1) Problems of using a device specific memory allocator:
-2) I/O bus, device memory characteristics
-3) Shared address space and migration
-4) Address space mirroring implementation and API
-5) Represent and manage device memory from core kernel point of view
-6) Migration to and from device memory
-7) Memory cgroup (memcg) and rss accounting
-
-
--------------------------------------------------------------------------------
-
-1) Problems of using a device specific memory allocator:
+Problems of using a device specific memory allocator
+====================================================
 
 Devices with a large amount of on board memory (several gigabytes) like GPUs
 have historically managed their memory through dedicated driver specific APIs.
@@ -77,9 +72,8 @@ are only do-able with a shared address space. It is also more reasonable to use
 a shared address space for all other patterns.
 
 
--------------------------------------------------------------------------------
-
-2) I/O bus, device memory characteristics
+I/O bus, device memory characteristics
+======================================
 
 I/O buses cripple shared address spaces due to a few limitations. Most I/O
 buses only allow basic memory access from device to main memory; even cache
@@ -109,9 +103,8 @@ access any memory but we must also permit any memory to be migrated to device
 memory while device is using it (blocking CPU access while it happens).
 
 
--------------------------------------------------------------------------------
-
-3) Shared address space and migration
+Shared address space and migration
+==================================
 
 HMM intends to provide two main features. First one is to share the address
 space by duplicating the CPU page table in the device page table so the same
@@ -148,23 +141,23 @@ ages device memory by migrating the part of the data set that is actively being
 used by the device.
 
 
--------------------------------------------------------------------------------
-
-4) Address space mirroring implementation and API
+Address space mirroring implementation and API
+==============================================
 
 Address space mirroring's main objective is to allow duplication of a range of
 CPU page table into a device page table; HMM helps keep both synchronized. A
 device driver that wants to mirror a process address space must start with the
-registration of an hmm_mirror struct:
+registration of an hmm_mirror struct::
 
  int hmm_mirror_register(struct hmm_mirror *mirror,
                          struct mm_struct *mm);
  int hmm_mirror_register_locked(struct hmm_mirror *mirror,
                                 struct mm_struct *mm);
 
+
 The locked variant is to be used when the driver is already holding mmap_sem
 of the mm in write mode. The mirror struct has a set of callbacks that are used
-to propagate CPU page tables:
+to propagate CPU page tables::
 
  struct hmm_mirror_ops {
      /* sync_cpu_device_pagetables() - synchronize page tables
@@ -193,10 +186,10 @@ The device driver must perform the update action to the range (mark range
 read only, or fully unmap, ...). The device must be done with the update before
 the driver callback returns.
 
-
 When the device driver wants to populate a range of virtual addresses, it can
-use either:
- int hmm_vma_get_pfns(struct vm_area_struct *vma,
+use either::
+
+  int hmm_vma_get_pfns(struct vm_area_struct *vma,
                       struct hmm_range *range,
                       unsigned long start,
                       unsigned long end,
@@ -221,7 +214,7 @@ provides a set of flags to help the driver identify special CPU page table
 entries.
 
 Locking with the update() callback is the most important aspect the driver must
-respect in order to keep things properly synchronized. The usage pattern is:
+respect in order to keep things properly synchronized. The usage pattern is::
 
  int driver_populate_range(...)
  {
@@ -262,9 +255,8 @@ report commands as executed is serialized (there is no point in doing this
 concurrently).
 
 
--------------------------------------------------------------------------------
-
-5) Represent and manage device memory from core kernel point of view
+Represent and manage device memory from core kernel point of view
+=================================================================
 
 Several different designs were tried to support device memory. First one used
 a device specific data structure to keep information about migrated memory and
@@ -280,14 +272,14 @@ unaware of the difference. We only need to make sure that no one ever tries to
 map those pages from the CPU side.
 
 HMM provides a set of helpers to register and hotplug device memory as a new
-region needing a struct page. This is offered through a very simple API:
+region needing a struct page. This is offered through a very simple API::
 
  struct hmm_devmem *hmm_devmem_add(const struct hmm_devmem_ops *ops,
                                    struct device *device,
                                    unsigned long size);
  void hmm_devmem_remove(struct hmm_devmem *devmem);
 
-The hmm_devmem_ops is where most of the important things are:
+The hmm_devmem_ops is where most of the important things are::
 
  struct hmm_devmem_ops {
      void (*free)(struct hmm_devmem *devmem, struct page *page);
@@ -306,13 +298,12 @@ which it cannot do. This second callback must trigger a migration back to
 system memory.
 
 
--------------------------------------------------------------------------------
-
-6) Migration to and from device memory
+Migration to and from device memory
+===================================
 
 Because the CPU cannot access device memory, migration must use the device DMA
 engine to perform copy from and to device memory. For this we need a new
-migration helper:
+migration helper::
 
  int migrate_vma(const struct migrate_vma_ops *ops,
                  struct vm_area_struct *vma,
@@ -331,7 +322,7 @@ migration might be for a range of addresses the device is actively accessing.
 
 The migrate_vma_ops struct defines two callbacks. First one (alloc_and_copy())
 controls destination memory allocation and copy operation. Second one is there
-to allow the device driver to perform cleanup operations after migration.
+to allow the device driver to perform cleanup operations after migration::
 
  struct migrate_vma_ops {
      void (*alloc_and_copy)(struct vm_area_struct *vma,
@@ -365,9 +356,8 @@ bandwidth but this is considered as a rare event and a price that we are
 willing to pay to keep all the code simpler.
 
 
--------------------------------------------------------------------------------
-
-7) Memory cgroup (memcg) and rss accounting
+Memory cgroup (memcg) and rss accounting
+========================================
 
 For now device memory is accounted as any regular page in rss counters (either
 anonymous if device page is used for anonymous, file if device page is used for

Documentation/vm/hwpoison.txt → Documentation/vm/hwpoison.rst

+.. hwpoison:
+
+========
+hwpoison
+========
+
 What is hwpoison?
+=================
 
 Upcoming Intel CPUs have support for recovering from some memory errors
-(``MCA recovery''). This requires the OS to declare a page "poisoned",
+(``MCA recovery``). This requires the OS to declare a page "poisoned",
 kill the processes associated with it and avoid using it in the future.
 
 This patchkit implements the necessary infrastructure in the VM.
@@ -46,9 +53,10 @@ address. This in theory allows other applications to handle
 memory failures too. The expection is that near all applications
 won't do that, but some very specialized ones might.
 
----
+Failure recovery modes
+======================
 
-There are two (actually three) modi memory failure recovery can be in:
+There are two (actually three) modes memory failure recovery can be in:
 
 vm.memory_failure_recovery sysctl set to zero:
 	All memory failures cause a panic. Do not attempt recovery.
@@ -67,9 +75,8 @@ late kill
 	This is best for memory error unaware applications and default
 	Note some pages are always handled as late kill.
 
----
-
-User control:
+User control
+============
 
 vm.memory_failure_recovery
 	See sysctl.txt
@@ -79,11 +86,19 @@ vm.memory_failure_early_kill
 
 PR_MCE_KILL
 	Set early/late kill mode/revert to system default
-	arg1: PR_MCE_KILL_CLEAR: Revert to system default
-	arg1: PR_MCE_KILL_SET: arg2 defines thread specific mode
-		PR_MCE_KILL_EARLY: Early kill
-		PR_MCE_KILL_LATE:  Late kill
-		PR_MCE_KILL_DEFAULT: Use system global default
+
+	arg1: PR_MCE_KILL_CLEAR:
+		Revert to system default
+	arg1: PR_MCE_KILL_SET:
+		arg2 defines thread specific mode
+
+		PR_MCE_KILL_EARLY:
+			Early kill
+		PR_MCE_KILL_LATE:
+			Late kill
+		PR_MCE_KILL_DEFAULT
+			Use system global default
+
 	Note that if you want to have a dedicated thread which handles
 	the SIGBUS(BUS_MCEERR_AO) on behalf of the process, you should
 	call prctl(PR_MCE_KILL_EARLY) on the designated thread. Otherwise,
@@ -92,77 +107,64 @@ PR_MCE_KILL
 PR_MCE_KILL_GET
 	return current mode
 
+Testing
+=======
 
----
-
-Testing:
-
-madvise(MADV_HWPOISON, ....)
-	(as root)
-	Poison a page in the process for testing
-
+* madvise(MADV_HWPOISON, ....) (as root) - Poison a page in the
+  process for testing
 
-hwpoison-inject module through debugfs
+* hwpoison-inject module through debugfs ``/sys/kernel/debug/hwpoison/``
 
-/sys/kernel/debug/hwpoison/
+  corrupt-pfn
+	Inject hwpoison fault at PFN echoed into this file. This does
+	some early filtering to avoid corrupted unintended pages in test suites.
 
-corrupt-pfn
+  unpoison-pfn
+	Software-unpoison page at PFN echoed into this file. This way
+	a page can be reused again.  This only works for Linux
+	injected failures, not for real memory failures.
 
-Inject hwpoison fault at PFN echoed into this file. This does
-some early filtering to avoid corrupted unintended pages in test suites.
+  Note these injection interfaces are not stable and might change between
+  kernel versions
 
-unpoison-pfn
+  corrupt-filter-dev-major, corrupt-filter-dev-minor
+	Only handle memory failures to pages associated with the file
+	system defined by block device major/minor.  -1U is the
+	wildcard value.  This should be only used for testing with
+	artificial injection.
 
-Software-unpoison page at PFN echoed into this file. This
-way a page can be reused again.
-This only works for Linux injected failures, not for real
-memory failures.
+  corrupt-filter-memcg
+	Limit injection to pages owned by memgroup. Specified by inode
+	number of the memcg.
 
-Note these injection interfaces are not stable and might change between
-kernel versions
+	Example::
 
-corrupt-filter-dev-major
-corrupt-filter-dev-minor
+		mkdir /sys/fs/cgroup/mem/hwpoison
 
-Only handle memory failures to pages associated with the file system defined
-by block device major/minor.  -1U is the wildcard value.
-This should be only used for testing with artificial injection.
+	        usemem -m 100 -s 1000 &
+		echo `jobs -p` > /sys/fs/cgroup/mem/hwpoison/tasks
 
-corrupt-filter-memcg
+		memcg_ino=$(ls -id /sys/fs/cgroup/mem/hwpoison | cut -f1 -d' ')
+		echo $memcg_ino > /debug/hwpoison/corrupt-filter-memcg
 
-Limit injection to pages owned by memgroup. Specified by inode number
-of the memcg.
+		page-types -p `pidof init`   --hwpoison  # shall do nothing
+		page-types -p `pidof usemem` --hwpoison  # poison its pages
 
-Example:
-        mkdir /sys/fs/cgroup/mem/hwpoison
+  corrupt-filter-flags-mask, corrupt-filter-flags-value
+	When specified, only poison pages if ((page_flags & mask) ==
+	value).  This allows stress testing of many kinds of
+	pages. The page_flags are the same as in /proc/kpageflags. The
+	flag bits are defined in include/linux/kernel-page-flags.h and
+	documented in Documentation/vm/pagemap.rst
 
-        usemem -m 100 -s 1000 &
-        echo `jobs -p` > /sys/fs/cgroup/mem/hwpoison/tasks
+* Architecture specific MCE injector
 
-        memcg_ino=$(ls -id /sys/fs/cgroup/mem/hwpoison | cut -f1 -d' ')
-        echo $memcg_ino > /debug/hwpoison/corrupt-filter-memcg
+  x86 has mce-inject, mce-test
 
-        page-types -p `pidof init`   --hwpoison  # shall do nothing
-        page-types -p `pidof usemem` --hwpoison  # poison its pages
+  Some portable hwpoison test programs in mce-test, see below.
 
-corrupt-filter-flags-mask
-corrupt-filter-flags-value
-
-When specified, only poison pages if ((page_flags & mask) == value).
-This allows stress testing of many kinds of pages. The page_flags
-are the same as in /proc/kpageflags. The flag bits are defined in
-include/linux/kernel-page-flags.h and documented in
-Documentation/vm/pagemap.txt
-
-Architecture specific MCE injector
-
-x86 has mce-inject, mce-test
-
-Some portable hwpoison test programs in mce-test, see blow.
-
----
-
-References:
+References
+==========
 
 http://halobates.de/mce-lc09-2.pdf
 	Overview presentation from LinuxCon 09
@@ -174,14 +176,11 @@ git://git.kernel.org/pub/scm/utils/cpu/mce/mce-inject.git
 	x86 specific injector
 
 
----
-
-Limitations:
-
+Limitations
+===========
 - Not all page types are supported and never will. Most kernel internal
-objects cannot be recovered, only LRU pages for now.
+  objects cannot be recovered, only LRU pages for now.
 - Right now hugepage support is missing.
 
 ---
 Andi Kleen, Oct 2009
-

Documentation/vm/idle_page_tracking.txt → Documentation/vm/idle_page_tracking.rst

-MOTIVATION
+.. _idle_page_tracking:
+
+==================
+Idle Page Tracking
+==================
+
+Motivation
+==========
 
 The idle page tracking feature allows to track which memory pages are being
 accessed by a workload and which are idle. This information can be useful for
@@ -8,10 +15,14 @@ or deciding where to place the workload within a compute cluster.
 
 It is enabled by CONFIG_IDLE_PAGE_TRACKING=y.
 
-USER API
+.. _user_api:
 
-The idle page tracking API is located at /sys/kernel/mm/page_idle. Currently,
-it consists of the only read-write file, /sys/kernel/mm/page_idle/bitmap.
+User API
+========
+
+The idle page tracking API is located at ``/sys/kernel/mm/page_idle``.
+Currently, it consists of the only read-write file,
+``/sys/kernel/mm/page_idle/bitmap``.
 
 The file implements a bitmap where each bit corresponds to a memory page. The
 bitmap is represented by an array of 8-byte integers, and the page at PFN #i is
@@ -19,8 +30,9 @@ mapped to bit #i%64 of array element #i/64, byte order is native. When a bit is
 set, the corresponding page is idle.
 
 A page is considered idle if it has not been accessed since it was marked idle
-(for more details on what "accessed" actually means see the IMPLEMENTATION
-DETAILS section). To mark a page idle one has to set the bit corresponding to
+(for more details on what "accessed" actually means see the :ref:`Implementation
+Details <impl_details>` section).
+To mark a page idle one has to set the bit corresponding to
 the page by writing to the file. A value written to the file is OR-ed with the
 current bitmap value.
 
@@ -30,9 +42,9 @@ page types (e.g. SLAB pages) an attempt to mark a page idle is silently ignored,
 and hence such pages are never reported idle.
 
 For huge pages the idle flag is set only on the head page, so one has to read
-/proc/kpageflags in order to correctly count idle huge pages.
+``/proc/kpageflags`` in order to correctly count idle huge pages.
 
-Reading from or writing to /sys/kernel/mm/page_idle/bitmap will return
+Reading from or writing to ``/sys/kernel/mm/page_idle/bitmap`` will return
 -EINVAL if you are not starting the read/write on an 8-byte boundary, or
 if the size of the read/write is not a multiple of 8 bytes. Writing to
 this file beyond max PFN will return -ENXIO.
@@ -41,21 +53,25 @@ That said, in order to estimate the amount of pages that are not used by a
 workload one should:
 
  1. Mark all the workload's pages as idle by setting corresponding bits in
-    /sys/kernel/mm/page_idle/bitmap. The pages can be found by reading
-    /proc/pid/pagemap if the workload is represented by a process, or by
-    filtering out alien pages using /proc/kpagecgroup in case the workload is
-    placed in a memory cgroup.
+    ``/sys/kernel/mm/page_idle/bitmap``. The pages can be found by reading
+    ``/proc/pid/pagemap`` if the workload is represented by a process, or by
+    filtering out alien pages using ``/proc/kpagecgroup`` in case the workload
+    is placed in a memory cgroup.
 
  2. Wait until the workload accesses its working set.
 
- 3. Read /sys/kernel/mm/page_idle/bitmap and count the number of bits set. If
-    one wants to ignore certain types of pages, e.g. mlocked pages since they
-    are not reclaimable, he or she can filter them out using /proc/kpageflags.
+ 3. Read ``/sys/kernel/mm/page_idle/bitmap`` and count the number of bits set.
+    If one wants to ignore certain types of pages, e.g. mlocked pages since they
+    are not reclaimable, he or she can filter them out using
+    ``/proc/kpageflags``.
+
+See Documentation/vm/pagemap.rst for more information about
+``/proc/pid/pagemap``, ``/proc/kpageflags``, and ``/proc/kpagecgroup``.
 
-See Documentation/vm/pagemap.txt for more information about /proc/pid/pagemap,
-/proc/kpageflags, and /proc/kpagecgroup.
+.. _impl_details:
 
-IMPLEMENTATION DETAILS
+Implementation Details
+======================
 
 The kernel internally keeps track of accesses to user memory pages in order to
 reclaim unreferenced pages first on memory shortage conditions. A page is
@@ -77,7 +93,8 @@ When a dirty page is written to swap or disk as a result of memory reclaim or
 exceeding the dirty memory limit, it is not marked referenced.
 
 The idle memory tracking feature adds a new page flag, the Idle flag. This flag
-is set manually, by writing to /sys/kernel/mm/page_idle/bitmap (see the USER API
+is set manually, by writing to ``/sys/kernel/mm/page_idle/bitmap`` (see the
+:ref:`User API <user_api>`
 section), and cleared automatically whenever a page is referenced as defined
 above.
 

Documentation/vm/index.rst

+=====================================
+Linux Memory Management Documentation
+=====================================
+
+This is a collection of documents about Linux memory management (mm) subsystem.
+
+User guides for MM features
+===========================
+
+The following documents provide guides for controlling and tuning
+various features of the Linux memory management
+
+.. toctree::
+   :maxdepth: 1
+
+   hugetlbpage
+   idle_page_tracking
+   ksm
+   numa_memory_policy
+   pagemap
+   transhuge
+   soft-dirty
+   swap_numa
+   userfaultfd
+   zswap
+
+Kernel developers MM documentation
+==================================
+
+The below documents describe MM internals with different level of
+details ranging from notes and mailing list responses to elaborate
+descriptions of data structures and algorithms.
+
+.. toctree::
+   :maxdepth: 1
+
+   active_mm
+   balance
+   cleancache
+   frontswap
+   highmem
+   hmm
+   hwpoison
+   hugetlbfs_reserv
+   mmu_notifier
+   numa
+   overcommit-accounting
+   page_migration
+   page_frags
+   page_owner
+   remap_file_pages
+   slub
+   split_page_table_lock
+   unevictable-lru
+   z3fold
+   zsmalloc

Documentation/vm/mmu_notifier.txt → Documentation/vm/mmu_notifier.rst

+.. _mmu_notifier:
+
 When do you need to notify inside page table lock ?
+===================================================
 
 When clearing a pte/pmd we are given a choice to notify the event through
-(notify version of *_clear_flush call mmu_notifier_invalidate_range) under
+(notify version of \*_clear_flush call mmu_notifier_invalidate_range) under
 the page table lock. But that notification is not necessary in all cases.
 
 For secondary TLB (non CPU TLB) like IOMMU TLB or device TLB (when device use
@@ -18,6 +21,7 @@ a page that might now be used by some completely different task.
 
 Case B is more subtle. For correctness it requires the following sequence to
 happen:
+
   - take page table lock
   - clear page table entry and notify ([pmd/pte]p_huge_clear_flush_notify())
   - set page table entry to point to new page
@@ -28,58 +32,60 @@ the device.
 
 Consider the following scenario (device use a feature similar to ATS/PASID):
 
-Two address addrA and addrB such that |addrA - addrB| >= PAGE_SIZE we assume
+Two address addrA and addrB such that \|addrA - addrB\| >= PAGE_SIZE we assume
 they are write protected for COW (other case of B apply too).
 
-[Time N] --------------------------------------------------------------------
-CPU-thread-0  {try to write to addrA}
-CPU-thread-1  {try to write to addrB}
-CPU-thread-2  {}
-CPU-thread-3  {}
-DEV-thread-0  {read addrA and populate device TLB}
-DEV-thread-2  {read addrB and populate device TLB}
-[Time N+1] ------------------------------------------------------------------
-CPU-thread-0  {COW_step0: {mmu_notifier_invalidate_range_start(addrA)}}
-CPU-thread-1  {COW_step0: {mmu_notifier_invalidate_range_start(addrB)}}
-CPU-thread-2  {}
-CPU-thread-3  {}
-DEV-thread-0  {}
-DEV-thread-2  {}
-[Time N+2] ------------------------------------------------------------------
-CPU-thread-0  {COW_step1: {update page table to point to new page for addrA}}
-CPU-thread-1  {COW_step1: {update page table to point to new page for addrB}}
-CPU-thread-2  {}
-CPU-thread-3  {}
-DEV-thread-0  {}
-DEV-thread-2  {}
-[Time N+3] ------------------------------------------------------------------
-CPU-thread-0  {preempted}
-CPU-thread-1  {preempted}
-CPU-thread-2  {write to addrA which is a write to new page}
-CPU-thread-3  {}
-DEV-thread-0  {}
-DEV-thread-2  {}
-[Time N+3] ------------------------------------------------------------------
-CPU-thread-0  {preempted}
-CPU-thread-1  {preempted}
-CPU-thread-2  {}
-CPU-thread-3  {write to addrB which is a write to new page}
-DEV-thread-0  {}
-DEV-thread-2  {}
-[Time N+4] ------------------------------------------------------------------
-CPU-thread-0  {preempted}
-CPU-thread-1  {COW_step3: {mmu_notifier_invalidate_range_end(addrB)}}
-CPU-thread-2  {}
-CPU-thread-3  {}
-DEV-thread-0  {}
-DEV-thread-2  {}
-[Time N+5] ------------------------------------------------------------------
-CPU-thread-0  {preempted}
-CPU-thread-1  {}
-CPU-thread-2  {}
-CPU-thread-3  {}
-DEV-thread-0  {read addrA from old page}
-DEV-thread-2  {read addrB from new page}
+::
+
+ [Time N] --------------------------------------------------------------------
+ CPU-thread-0  {try to write to addrA}
+ CPU-thread-1  {try to write to addrB}
+ CPU-thread-2  {}
+ CPU-thread-3  {}
+ DEV-thread-0  {read addrA and populate device TLB}
+ DEV-thread-2  {read addrB and populate device TLB}
+ [Time N+1] ------------------------------------------------------------------
+ CPU-thread-0  {COW_step0: {mmu_notifier_invalidate_range_start(addrA)}}
+ CPU-thread-1  {COW_step0: {mmu_notifier_invalidate_range_start(addrB)}}
+ CPU-thread-2  {}
+ CPU-thread-3  {}
+ DEV-thread-0  {}
+ DEV-thread-2  {}
+ [Time N+2] ------------------------------------------------------------------
+ CPU-thread-0  {COW_step1: {update page table to point to new page for addrA}}
+ CPU-thread-1  {COW_step1: {update page table to point to new page for addrB}}
+ CPU-thread-2  {}
+ CPU-thread-3  {}
+ DEV-thread-0  {}
+ DEV-thread-2  {}
+ [Time N+3] ------------------------------------------------------------------
+ CPU-thread-0  {preempted}
+ CPU-thread-1  {preempted}
+ CPU-thread-2  {write to addrA which is a write to new page}
+ CPU-thread-3  {}
+ DEV-thread-0  {}
+ DEV-thread-2  {}
+ [Time N+3] ------------------------------------------------------------------
+ CPU-thread-0  {preempted}
+ CPU-thread-1  {preempted}
+ CPU-thread-2  {}
+ CPU-thread-3  {write to addrB which is a write to new page}
+ DEV-thread-0  {}
+ DEV-thread-2  {}
+ [Time N+4] ------------------------------------------------------------------
+ CPU-thread-0  {preempted}
+ CPU-thread-1  {COW_step3: {mmu_notifier_invalidate_range_end(addrB)}}
+ CPU-thread-2  {}
+ CPU-thread-3  {}
+ DEV-thread-0  {}
+ DEV-thread-2  {}
+ [Time N+5] ------------------------------------------------------------------
+ CPU-thread-0  {preempted}
+ CPU-thread-1  {}
+ CPU-thread-2  {}
+ CPU-thread-3  {}
+ DEV-thread-0  {read addrA from old page}
+ DEV-thread-2  {read addrB from new page}
 
 So here because at time N+2 the clear page table entry was not pair with a
 notification to invalidate the secondary TLB, the device see the new value for

Documentation/vm/numa → Documentation/vm/numa.rst

+.. _numa:
+
 Started Nov 1999 by Kanoj Sarcar <kanoj@sgi.com>
 
+=============
 What is NUMA?
+=============
 
 This question can be answered from a couple of perspectives:  the
 hardware view and the Linux software view.
@@ -106,7 +110,7 @@ to improve NUMA locality using various CPU affinity command line interfaces,
 such as taskset(1) and numactl(1), and program interfaces such as
 sched_setaffinity(2).  Further, one can modify the kernel's default local
 allocation behavior using Linux NUMA memory policy.
-[see Documentation/vm/numa_memory_policy.txt.]
+[see Documentation/vm/numa_memory_policy.rst.]
 
 System administrators can restrict the CPUs and nodes' memories that a non-
 privileged user can specify in the scheduling or NUMA commands and functions

Documentation/vm/overcommit-accounting

-The Linux kernel supports the following overcommit handling modes
-
-0	-	Heuristic overcommit handling. Obvious overcommits of
-		address space are refused. Used for a typical system. It
-		ensures a seriously wild allocation fails while allowing
-		overcommit to reduce swap usage.  root is allowed to 
-		allocate slightly more memory in this mode. This is the 
-		default.
-
-1	-	Always overcommit. Appropriate for some scientific
-		applications. Classic example is code using sparse arrays
-		and just relying on the virtual memory consisting almost
-		entirely of zero pages.
-
-2	-	Don't overcommit. The total address space commit
-		for the system is not permitted to exceed swap + a
-		configurable amount (default is 50%) of physical RAM.
-		Depending on the amount you use, in most situations
-		this means a process will not be killed while accessing
-		pages but will receive errors on memory allocation as
-		appropriate.
-
-		Useful for applications that want to guarantee their
-		memory allocations will be available in the future
-		without having to initialize every page.
-
-The overcommit policy is set via the sysctl `vm.overcommit_memory'.
-
-The overcommit amount can be set via `vm.overcommit_ratio' (percentage)
-or `vm.overcommit_kbytes' (absolute value).
-
-The current overcommit limit and amount committed are viewable in
-/proc/meminfo as CommitLimit and Committed_AS respectively.
-
-Gotchas
--------
-
-The C language stack growth does an implicit mremap. If you want absolute
-guarantees and run close to the edge you MUST mmap your stack for the 
-largest size you think you will need. For typical stack usage this does
-not matter much but it's a corner case if you really really care
-
-In mode 2 the MAP_NORESERVE flag is ignored. 
-
-
-How It Works
-------------
-
-The overcommit is based on the following rules
-
-For a file backed map
-	SHARED or READ-only	-	0 cost (the file is the map not swap)
-	PRIVATE WRITABLE	-	size of mapping per instance
-
-For an anonymous or /dev/zero map
-	SHARED			-	size of mapping
-	PRIVATE READ-only	-	0 cost (but of little use)
-	PRIVATE WRITABLE	-	size of mapping per instance
-
-Additional accounting
-	Pages made writable copies by mmap
-	shmfs memory drawn from the same pool
-
-Status
-------
-
-o	We account mmap memory mappings
-o	We account mprotect changes in commit
-o	We account mremap changes in size
-o	We account brk
-o	We account munmap
-o	We report the commit status in /proc
-o	Account and check on fork
-o	Review stack handling/building on exec
-o	SHMfs accounting
-o	Implement actual limit enforcement
-
-To Do
------
-o	Account ptrace pages (this is hard)

Documentation/vm/overcommit-accounting.rst

+.. _overcommit_accounting:
+
+=====================
+Overcommit Accounting
+=====================
+
+The Linux kernel supports the following overcommit handling modes
+
+0
+	Heuristic overcommit handling. Obvious overcommits of address
+	space are refused. Used for a typical system. It ensures a
+	seriously wild allocation fails while allowing overcommit to
+	reduce swap usage.  root is allowed to allocate slightly more
+	memory in this mode. This is the default.
+
+1
+	Always overcommit. Appropriate for some scientific
+	applications. Classic example is code using sparse arrays and
+	just relying on the virtual memory consisting almost entirely
+	of zero pages.
+
+2
+	Don't overcommit. The total address space commit for the
+	system is not permitted to exceed swap + a configurable amount
+	(default is 50%) of physical RAM.  Depending on the amount you
+	use, in most situations this means a process will not be
+	killed while accessing pages but will receive errors on memory
+	allocation as appropriate.
+
+	Useful for applications that want to guarantee their memory
+	allocations will be available in the future without having to
+	initialize every page.
+
+The overcommit policy is set via the sysctl ``vm.overcommit_memory``.
+
+The overcommit amount can be set via ``vm.overcommit_ratio`` (percentage)
+or ``vm.overcommit_kbytes`` (absolute value).
+
+The current overcommit limit and amount committed are viewable in
+``/proc/meminfo`` as CommitLimit and Committed_AS respectively.
+
+Gotchas
+=======
+
+The C language stack growth does an implicit mremap. If you want absolute
+guarantees and run close to the edge you MUST mmap your stack for the
+largest size you think you will need. For typical stack usage this does
+not matter much but it's a corner case if you really really care
+
+In mode 2 the MAP_NORESERVE flag is ignored.
+
+
+How It Works
+============
+
+The overcommit is based on the following rules
+
+For a file backed map
+	| SHARED or READ-only	-	0 cost (the file is the map not swap)
+	| PRIVATE WRITABLE	-	size of mapping per instance
+
+For an anonymous or ``/dev/zero`` map
+	| SHARED			-	size of mapping
+	| PRIVATE READ-only	-	0 cost (but of little use)
+	| PRIVATE WRITABLE	-	size of mapping per instance
+
+Additional accounting
+	| Pages made writable copies by mmap
+	| shmfs memory drawn from the same pool
+
+Status
+======
+
+*	We account mmap memory mappings
+*	We account mprotect changes in commit
+*	We account mremap changes in size
+*	We account brk
+*	We account munmap
+*	We report the commit status in /proc
+*	Account and check on fork
+*	Review stack handling/building on exec
+*	SHMfs accounting
+*	Implement actual limit enforcement
+
+To Do
+=====
+*	Account ptrace pages (this is hard)

Documentation/vm/page_frags → Documentation/vm/page_frags.rst

+.. _page_frags:
+
+==============
 Page fragments
---------------
+==============
 
 A page fragment is an arbitrary-length arbitrary-offset area of memory
 which resides within a 0 or higher order compound page.  Multiple

Documentation/vm/page_owner.txt → Documentation/vm/page_owner.rst

+.. _page_owner:
+
+==================================================
 page owner: Tracking about who allocated each page
------------------------------------------------------------
+==================================================
 
-* Introduction
+Introduction
+============
 
 page owner is for the tracking about who allocated each page.
 It can be used to debug memory leak or to find a memory hogger.
@@ -34,13 +38,15 @@ not affect to allocation performance, especially if the static keys jump
 label patching functionality is available. Following is the kernel's code
 size change due to this facility.
 
-- Without page owner
+- Without page owner::
+
    text    data     bss     dec     hex filename
-  40662    1493     644   42799    a72f mm/page_alloc.o
+   40662   1493     644   42799    a72f mm/page_alloc.o
+
+- With page owner::
 
-- With page owner
    text    data     bss     dec     hex filename
-  40892    1493     644   43029    a815 mm/page_alloc.o
+   40892   1493     644   43029    a815 mm/page_alloc.o
    1427      24       8    1459     5b3 mm/page_ext.o
    2722      50       0    2772     ad4 mm/page_owner.o
 
@@ -62,21 +68,23 @@ are catched and marked, although they are mostly allocated from struct
 page extension feature. Anyway, after that, no page is left in
 un-tracking state.
 
-* Usage
+Usage
+=====
+
+1) Build user-space helper::
 
-1) Build user-space helper
 	cd tools/vm
 	make page_owner_sort
 
-2) Enable page owner
-	Add "page_owner=on" to boot cmdline.
+2) Enable page owner: add "page_owner=on" to boot cmdline.
 
 3) Do the job what you want to debug
 
-4) Analyze information from page owner
+4) Analyze information from page owner::
+
 	cat /sys/kernel/debug/page_owner > page_owner_full.txt
 	grep -v ^PFN page_owner_full.txt > page_owner.txt
 	./page_owner_sort page_owner.txt sorted_page_owner.txt
 
-	See the result about who allocated each page
-	in the sorted_page_owner.txt.
+   See the result about who allocated each page
+   in the ``sorted_page_owner.txt``.

Documentation/vm/pagemap.txt → Documentation/vm/pagemap.rst

-pagemap, from the userspace perspective
----------------------------------------
+.. _pagemap:
+
+======================================
+pagemap from the Userspace Perspective
+======================================
 
 pagemap is a new (as of 2.6.25) set of interfaces in the kernel that allow
 userspace programs to examine the page tables and related information by
-reading files in /proc.
+reading files in ``/proc``.
 
 There are four components to pagemap:
 
- * /proc/pid/pagemap.  This file lets a userspace process find out which
+ * ``/proc/pid/pagemap``.  This file lets a userspace process find out which
    physical frame each virtual page is mapped to.  It contains one 64-bit
    value for each virtual page, containing the following data (from
    fs/proc/task_mmu.c, above pagemap_read):
@@ -15,7 +18,7 @@ There are four components to pagemap:
     * Bits 0-54  page frame number (PFN) if present
     * Bits 0-4   swap type if swapped
     * Bits 5-54  swap offset if swapped
-    * Bit  55    pte is soft-dirty (see Documentation/vm/soft-dirty.txt)
+    * Bit  55    pte is soft-dirty (see Documentation/vm/soft-dirty.rst)
     * Bit  56    page exclusively mapped (since 4.2)
     * Bits 57-60 zero
     * Bit  61    page is file-page or shared-anon (since 3.5)
@@ -37,24 +40,24 @@ There are four components to pagemap:
    determine which areas of memory are actually mapped and llseek to
    skip over unmapped regions.
 
- * /proc/kpagecount.  This file contains a 64-bit count of the number of
+ * ``/proc/kpagecount``.  This file contains a 64-bit count of the number of
    times each page is mapped, indexed by PFN.
 
- * /proc/kpageflags.  This file contains a 64-bit set of flags for each
+ * ``/proc/kpageflags``.  This file contains a 64-bit set of flags for each
    page, indexed by PFN.
 
-   The flags are (from fs/proc/page.c, above kpageflags_read):
-
-     0. LOCKED
-     1. ERROR
-     2. REFERENCED
-     3. UPTODATE
-     4. DIRTY
-     5. LRU
-     6. ACTIVE
-     7. SLAB
-     8. WRITEBACK
-     9. RECLAIM
+   The flags are (from ``fs/proc/page.c``, above kpageflags_read):
+
+    0. LOCKED
+    1. ERROR
+    2. REFERENCED
+    3. UPTODATE
+    4. DIRTY
+    5. LRU
+    6. ACTIVE
+    7. SLAB
+    8. WRITEBACK
+    9. RECLAIM
     10. BUDDY
     11. MMAP
     12. ANON
@@ -72,98 +75,108 @@ There are four components to pagemap:
     24. ZERO_PAGE
     25. IDLE
 
- * /proc/kpagecgroup.  This file contains a 64-bit inode number of the
+ * ``/proc/kpagecgroup``.  This file contains a 64-bit inode number of the
    memory cgroup each page is charged to, indexed by PFN. Only available when
    CONFIG_MEMCG is set.
 
 Short descriptions to the page flags:
-
- 0. LOCKED
-    page is being locked for exclusive access, eg. by undergoing read/write IO
-
- 7. SLAB
-    page is managed by the SLAB/SLOB/SLUB/SLQB kernel memory allocator
-    When compound page is used, SLUB/SLQB will only set this flag on the head
-    page; SLOB will not flag it at all.
-
-10. BUDDY
+=====================================
+
+0 - LOCKED
+   page is being locked for exclusive access, eg. by undergoing read/write IO
+7 - SLAB
+   page is managed by the SLAB/SLOB/SLUB/SLQB kernel memory allocator
+   When compound page is used, SLUB/SLQB will only set this flag on the head
+   page; SLOB will not flag it at all.
+10 - BUDDY
     a free memory block managed by the buddy system allocator
     The buddy system organizes free memory in blocks of various orders.
     An order N block has 2^N physically contiguous pages, with the BUDDY flag
     set for and _only_ for the first page.
-
-15. COMPOUND_HEAD
-16. COMPOUND_TAIL
+15 - COMPOUND_HEAD
     A compound page with order N consists of 2^N physically contiguous pages.
     A compound page with order 2 takes the form of "HTTT", where H donates its
     head page and T donates its tail page(s).  The major consumers of compound
-    pages are hugeTLB pages (Documentation/vm/hugetlbpage.txt), the SLUB etc.
+    pages are hugeTLB pages (Documentation/vm/hugetlbpage.rst), the SLUB etc.
     memory allocators and various device drivers. However in this interface,
     only huge/giga pages are made visible to end users.
-17. HUGE
+16 - COMPOUND_TAIL
+    A compound page tail (see description above).
+17 - HUGE
     this is an integral part of a HugeTLB page
-
-19. HWPOISON
+19 - HWPOISON
     hardware detected memory corruption on this page: don't touch the data!
-
-20. NOPAGE
+20 - NOPAGE
     no page frame exists at the requested address
-
-21. KSM
+21 - KSM
     identical memory pages dynamically shared between one or more processes
-
-22. THP
+22 - THP
     contiguous pages which construct transparent hugepages
-
-23. BALLOON
+23 - BALLOON
     balloon compaction page
-
-24. ZERO_PAGE
+24 - ZERO_PAGE
     zero page for pfn_zero or huge_zero page
-
-25. IDLE
+25 - IDLE
     page has not been accessed since it was marked idle (see
-    Documentation/vm/idle_page_tracking.txt). Note that this flag may be
+    Documentation/vm/idle_page_tracking.rst). Note that this flag may be
     stale in case the page was accessed via a PTE. To make sure the flag
-    is up-to-date one has to read /sys/kernel/mm/page_idle/bitmap first.
-
-    [IO related page flags]
- 1. ERROR     IO error occurred
- 3. UPTODATE  page has up-to-date data
-              ie. for file backed page: (in-memory data revision >= on-disk one)
- 4. DIRTY     page has been written to, hence contains new data
-              ie. for file backed page: (in-memory data revision >  on-disk one)
- 8. WRITEBACK page is being synced to disk
-
-    [LRU related page flags]
- 5. LRU         page is in one of the LRU lists
- 6. ACTIVE      page is in the active LRU list
-18. UNEVICTABLE page is in the unevictable (non-)LRU list
-                It is somehow pinned and not a candidate for LRU page reclaims,
-		eg. ramfs pages, shmctl(SHM_LOCK) and mlock() memory segments
- 2. REFERENCED  page has been referenced since last LRU list enqueue/requeue
- 9. RECLAIM     page will be reclaimed soon after its pageout IO completed
-11. MMAP        a memory mapped page
-12. ANON        a memory mapped page that is not part of a file
-13. SWAPCACHE   page is mapped to swap space, ie. has an associated swap entry
-14. SWAPBACKED  page is backed by swap/RAM
+    is up-to-date one has to read ``/sys/kernel/mm/page_idle/bitmap`` first.
+
+IO related page flags
+---------------------
+
+1 - ERROR
+   IO error occurred
+3 - UPTODATE
+   page has up-to-date data
+   ie. for file backed page: (in-memory data revision >= on-disk one)
+4 - DIRTY
+   page has been written to, hence contains new data
+   ie. for file backed page: (in-memory data revision >  on-disk one)
+8 - WRITEBACK
+   page is being synced to disk
+
+LRU related page flags
+----------------------
+
+5 - LRU
+   page is in one of the LRU lists
+6 - ACTIVE
+   page is in the active LRU list
+18 - UNEVICTABLE
+   page is in the unevictable (non-)LRU list It is somehow pinned and
+   not a candidate for LRU page reclaims, eg. ramfs pages,
+   shmctl(SHM_LOCK) and mlock() memory segments
+2 - REFERENCED
+   page has been referenced since last LRU list enqueue/requeue
+9 - RECLAIM
+   page will be reclaimed soon after its pageout IO completed
+11 - MMAP
+   a memory mapped page
+12 - ANON
+   a memory mapped page that is not part of a file
+13 - SWAPCACHE
+   page is mapped to swap space, ie. has an associated swap entry
+14 - SWAPBACKED
+   page is backed by swap/RAM
 
 The page-types tool in the tools/vm directory can be used to query the
 above flags.
 
-Using pagemap to do something useful:
+Using pagemap to do something useful
+====================================
 
 The general procedure for using pagemap to find out about a process' memory
 usage goes like this:
 
- 1. Read /proc/pid/maps to determine which parts of the memory space are
+ 1. Read ``/proc/pid/maps`` to determine which parts of the memory space are
     mapped to what.
  2. Select the maps you are interested in -- all of them, or a particular
     library, or the stack or the heap, etc.
- 3. Open /proc/pid/pagemap and seek to the pages you would like to examine.
+ 3. Open ``/proc/pid/pagemap`` and seek to the pages you would like to examine.
  4. Read a u64 for each page from pagemap.
- 5. Open /proc/kpagecount and/or /proc/kpageflags.  For each PFN you just
-    read, seek to that entry in the file, and read the data you want.
+ 5. Open ``/proc/kpagecount`` and/or ``/proc/kpageflags``.  For each PFN you
+    just read, seek to that entry in the file, and read the data you want.
 
 For example, to find the "unique set size" (USS), which is the amount of
 memory that a process is using that is not shared with any other process,
@@ -171,7 +184,8 @@ you can go through every map in the process, find the PFNs, look those up
 in kpagecount, and tally up the number of pages that are only referenced
 once.
 
-Other notes:
+Other notes
+===========
 
 Reading from any of the files will return -EINVAL if you are not starting
 the read on an 8-byte boundary (e.g., if you sought an odd number of bytes

Documentation/vm/remap_file_pages.txt → Documentation/vm/remap_file_pages.rst

+.. _remap_file_pages:
+
+==============================
+remap_file_pages() system call
+==============================
+
 The remap_file_pages() system call is used to create a nonlinear mapping,
 that is, a mapping in which the pages of the file are mapped into a
 nonsequential order in memory. The advantage of using remap_file_pages()

Documentation/vm/soft-dirty.txt → Documentation/vm/soft-dirty.rst

-                            SOFT-DIRTY PTEs
+.. _soft_dirty:
 
-  The soft-dirty is a bit on a PTE which helps to track which pages a task
+===============
+Soft-Dirty PTEs
+===============
+
+The soft-dirty is a bit on a PTE which helps to track which pages a task
 writes to. In order to do this tracking one should
 
   1. Clear soft-dirty bits from the task's PTEs.
 
-     This is done by writing "4" into the /proc/PID/clear_refs file of the
+     This is done by writing "4" into the ``/proc/PID/clear_refs`` file of the
      task in question.
 
   2. Wait some time.
 
   3. Read soft-dirty bits from the PTEs.
 
-     This is done by reading from the /proc/PID/pagemap. The bit 55 of the
+     This is done by reading from the ``/proc/PID/pagemap``. The bit 55 of the
      64-bit qword is the soft-dirty one. If set, the respective PTE was
      written to since step 1.
 
 
-  Internally, to do this tracking, the writable bit is cleared from PTEs
+Internally, to do this tracking, the writable bit is cleared from PTEs
 when the soft-dirty bit is cleared. So, after this, when the task tries to
 modify a page at some virtual address the #PF occurs and the kernel sets
 the soft-dirty bit on the respective PTE.
 
-  Note, that although all the task's address space is marked as r/o after the
+Note, that although all the task's address space is marked as r/o after the
 soft-dirty bits clear, the #PF-s that occur after that are processed fast.
 This is so, since the pages are still mapped to physical memory, and thus all
 the kernel does is finds this fact out and puts both writable and soft-dirty
 bits on the PTE.
 
-  While in most cases tracking memory changes by #PF-s is more than enough
+While in most cases tracking memory changes by #PF-s is more than enough
 there is still a scenario when we can lose soft dirty bits -- a task
 unmaps a previously mapped memory region and then maps a new one at exactly
 the same place. When unmap is called, the kernel internally clears PTE values
@@ -36,7 +40,7 @@ including soft dirty bits. To notify user space application about such
 memory region renewal the kernel always marks new memory regions (and
 expanded regions) as soft dirty.
 
-  This feature is actively used by the checkpoint-restore project. You
+This feature is actively used by the checkpoint-restore project. You
 can find more details about it on http://criu.org
 
 

Documentation/vm/split_page_table_lock → Documentation/vm/split_page_table_lock.rst

+.. _split_page_table_lock:
+
+=====================
 Split page table lock
 =====================
 
@@ -11,6 +14,7 @@ access to the table. At the moment we use split lock for PTE and PMD
 tables. Access to higher level tables protected by mm->page_table_lock.
 
 There are helpers to lock/unlock a table and other accessor functions:
+
  - pte_offset_map_lock()
 	maps pte and takes PTE table lock, returns pointer to the taken
 	lock;
@@ -34,12 +38,13 @@ Split page table lock for PMD tables is enabled, if it's enabled for PTE
 tables and the architecture supports it (see below).
 
 Hugetlb and split page table lock
----------------------------------
+=================================
 
 Hugetlb can support several page sizes. We use split lock only for PMD
 level, but not for PUD.
 
 Hugetlb-specific helpers:
+
  - huge_pte_lock()
 	takes pmd split lock for PMD_SIZE page, mm->page_table_lock
 	otherwise;
@@ -47,7 +52,7 @@ Hugetlb-specific helpers:
 	returns pointer to table lock;
 
 Support of split page table lock by an architecture
----------------------------------------------------
+===================================================
 
 There's no need in special enabling of PTE split page table lock:
 everything required is done by pgtable_page_ctor() and pgtable_page_dtor(),
@@ -73,7 +78,7 @@ NOTE: pgtable_page_ctor() and pgtable_pmd_page_ctor() can fail -- it must
 be handled properly.
 
 page->ptl
----------
+=========
 
 page->ptl is used to access split page table lock, where 'page' is struct
 page of page containing the table. It shares storage with page->private
@@ -81,6 +86,7 @@ page of page containing the table. It shares storage with page->private
 
 To avoid increasing size of struct page and have best performance, we use a
 trick:
+
  - if spinlock_t fits into long, we use page->ptr as spinlock, so we
    can avoid indirect access and save a cache line.
  - if size of spinlock_t is bigger then size of long, we use page->ptl as

Documentation/vm/swap_numa.txt → Documentation/vm/swap_numa.rst

+.. _swap_numa:
+
+===========================================
 Automatically bind swap device to numa node
--------------------------------------------
+===========================================
 
 If the system has more than one swap device and swap device has the node
 information, we can make use of this information to decide which swap
@@ -7,15 +10,16 @@ device to use in get_swap_pages() to get better performance.
 
 
 How to use this feature
------------------------
+=======================
 
 Swap device has priority and that decides the order of it to be used. To make
 use of automatically binding, there is no need to manipulate priority settings
 for swap devices. e.g. on a 2 node machine, assume 2 swap devices swapA and
 swapB, with swapA attached to node 0 and swapB attached to node 1, are going
-to be swapped on. Simply swapping them on by doing:
-# swapon /dev/swapA
-# swapon /dev/swapB
+to be swapped on. Simply swapping them on by doing::
+
+	# swapon /dev/swapA
+	# swapon /dev/swapB
 
 Then node 0 will use the two swap devices in the order of swapA then swapB and
 node 1 will use the two swap devices in the order of swapB then swapA. Note
@@ -24,32 +28,39 @@ that the order of them being swapped on doesn't matter.
 A more complex example on a 4 node machine. Assume 6 swap devices are going to
 be swapped on: swapA and swapB are attached to node 0, swapC is attached to
 node 1, swapD and swapE are attached to node 2 and swapF is attached to node3.
-The way to swap them on is the same as above:
-# swapon /dev/swapA
-# swapon /dev/swapB
-# swapon /dev/swapC
-# swapon /dev/swapD
-# swapon /dev/swapE
-# swapon /dev/swapF
-
-Then node 0 will use them in the order of:
-swapA/swapB -> swapC -> swapD -> swapE -> swapF
+The way to swap them on is the same as above::
+
+	# swapon /dev/swapA
+	# swapon /dev/swapB
+	# swapon /dev/swapC
+	# swapon /dev/swapD
+	# swapon /dev/swapE
+	# swapon /dev/swapF
+
+Then node 0 will use them in the order of::
+
+	swapA/swapB -> swapC -> swapD -> swapE -> swapF
+
 swapA and swapB will be used in a round robin mode before any other swap device.
 
-node 1 will use them in the order of:
-swapC -> swapA -> swapB -> swapD -> swapE -> swapF
+node 1 will use them in the order of::
+
+	swapC -> swapA -> swapB -> swapD -> swapE -> swapF
+
+node 2 will use them in the order of::
+
+	swapD/swapE -> swapA -> swapB -> swapC -> swapF
 
-node 2 will use them in the order of:
-swapD/swapE -> swapA -> swapB -> swapC -> swapF
 Similaly, swapD and swapE will be used in a round robin mode before any
 other swap devices.
 
-node 3 will use them in the order of:
-swapF -> swapA -> swapB -> swapC -> swapD -> swapE
+node 3 will use them in the order of::
+
+	swapF -> swapA -> swapB -> swapC -> swapD -> swapE
 
 
 Implementation details
-----------------------
+======================
 
 The current code uses a priority based list, swap_avail_list, to decide
 which swap device to use and if multiple swap devices share the same

Documentation/vm/z3fold.txt → Documentation/vm/z3fold.rst

+.. _z3fold:
+
+======
 z3fold
-------
+======
 
 z3fold is a special purpose allocator for storing compressed pages.
 It is designed to store up to three compressed pages per physical page.
@@ -7,6 +10,7 @@ It is a zbud derivative which allows for higher compression
 ratio keeping the simplicity and determinism of its predecessor.
 
 The main differences between z3fold and zbud are:
+
 * unlike zbud, z3fold allows for up to PAGE_SIZE allocations
 * z3fold can hold up to 3 compressed pages in its page
 * z3fold doesn't export any API itself and is thus intended to be used

MAINTAINERS

@@ -15621,7 +15621,7 @@ L:	linux-mm@kvack.org
 S:	Maintained
 F:	mm/zsmalloc.c
 F:	include/linux/zsmalloc.h
-F:	Documentation/vm/zsmalloc.txt
+F:	Documentation/vm/zsmalloc.rst
 
 ZSWAP COMPRESSED SWAP CACHING
 M:	Seth Jennings <sjenning@redhat.com>

arch/alpha/Kconfig

@@ -585,7 +585,7 @@ config ARCH_DISCONTIGMEM_ENABLE
 	  Say Y to support efficient handling of discontiguous physical memory,
 	  for architectures which are either NUMA (Non-Uniform Memory Access)
 	  or have huge holes in the physical address space for other reasons.
-	  See <file:Documentation/vm/numa> for more.
+	  See <file:Documentation/vm/numa.rst> for more.
 
 source "mm/Kconfig"
 

arch/ia64/Kconfig

@@ -397,7 +397,7 @@ config ARCH_DISCONTIGMEM_ENABLE
 	  Say Y to support efficient handling of discontiguous physical memory,
 	  for architectures which are either NUMA (Non-Uniform Memory Access)
 	  or have huge holes in the physical address space for other reasons.
- 	  See <file:Documentation/vm/numa> for more.
+	  See <file:Documentation/vm/numa.rst> for more.
 
 config ARCH_FLATMEM_ENABLE
 	def_bool y

arch/mips/Kconfig

@@ -2556,7 +2556,7 @@ config ARCH_DISCONTIGMEM_ENABLE
 	  Say Y to support efficient handling of discontiguous physical memory,
 	  for architectures which are either NUMA (Non-Uniform Memory Access)
 	  or have huge holes in the physical address space for other reasons.
-	  See <file:Documentation/vm/numa> for more.
+	  See <file:Documentation/vm/numa.rst> for more.
 
 config ARCH_SPARSEMEM_ENABLE
 	bool

arch/powerpc/Kconfig

@@ -883,7 +883,7 @@ config PPC_MEM_KEYS
 	  page-based protections, but without requiring modification of the
 	  page tables when an application changes protection domains.
 
-	  For details, see Documentation/vm/protection-keys.txt
+	  For details, see Documentation/vm/protection-keys.rst
 
 	  If unsure, say y.
 

fs/Kconfig

@@ -196,7 +196,7 @@ config HUGETLBFS
 	help
 	  hugetlbfs is a filesystem backing for HugeTLB pages, based on
 	  ramfs. For architectures that support it, say Y here and read
-	  <file:Documentation/vm/hugetlbpage.txt> for details.
+	  <file:Documentation/vm/hugetlbpage.rst> for details.
 
 	  If unsure, say N.
 

fs/dax.c

@@ -677,7 +677,7 @@ static void dax_mapping_entry_mkclean(struct address_space *mapping,
 		 * downgrading page table protection not changing it to point
 		 * to a new page.
 		 *
-		 * See Documentation/vm/mmu_notifier.txt
+		 * See Documentation/vm/mmu_notifier.rst
 		 */
 		if (pmdp) {
 #ifdef CONFIG_FS_DAX_PMD

include/linux/hmm.h

@@ -16,7 +16,7 @@
 /*
  * Heterogeneous Memory Management (HMM)
  *
- * See Documentation/vm/hmm.txt for reasons and overview of what HMM is and it
+ * See Documentation/vm/hmm.rst for reasons and overview of what HMM is and it
  * is for. Here we focus on the HMM API description, with some explanation of
  * the underlying implementation.
  *