- 06 Jul, 2017 40 commits
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Michal Hocko authored
__first_valid_page skips over invalid pfns in the range but it might still stumble over offline pages. At least start_isolate_page_range will mark those set_migratetype_isolate. This doesn't represent any immediate AFAICS because alloc_contig_range will fail to isolate those pages but it relies on not fully initialized page which will become a problem later when we stop associating offline pages to zones. Use pfn_to_online_page to handle this. This is more a preparatory patch than a fix. Link: http://lkml.kernel.org/r/20170515085827.16474-10-mhocko@kernel.orgSigned-off-by:
Michal Hocko <mhocko@suse.com> Acked-by:
Vlastimil Babka <vbabka@suse.cz> Cc: Andi Kleen <ak@linux.intel.com> Cc: Andrea Arcangeli <aarcange@redhat.com> Cc: Balbir Singh <bsingharora@gmail.com> Cc: Dan Williams <dan.j.williams@intel.com> Cc: Daniel Kiper <daniel.kiper@oracle.com> Cc: David Rientjes <rientjes@google.com> Cc: Heiko Carstens <heiko.carstens@de.ibm.com> Cc: Igor Mammedov <imammedo@redhat.com> Cc: Jerome Glisse <jglisse@redhat.com> Cc: Joonsoo Kim <js1304@gmail.com> Cc: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: Mel Gorman <mgorman@suse.de> Cc: Reza Arbab <arbab@linux.vnet.ibm.com> Cc: Tobias Regnery <tobias.regnery@gmail.com> Cc: Toshi Kani <toshi.kani@hpe.com> Cc: Vitaly Kuznetsov <vkuznets@redhat.com> Cc: Xishi Qiu <qiuxishi@huawei.com> Cc: Yasuaki Ishimatsu <isimatu.yasuaki@jp.fujitsu.com> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Signed-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Michal Hocko authored
__reset_isolation_suitable walks the whole zone pfn range and it tries to jump over holes by checking the zone for each page. It might still stumble over offline pages, though. Skip those by checking pfn_to_online_page() Link: http://lkml.kernel.org/r/20170515085827.16474-9-mhocko@kernel.orgSigned-off-by:
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Michal Hocko authored
__pageblock_pfn_to_page has two users currently, set_zone_contiguous which checks whether the given zone contains holes and pageblock_pfn_to_page which then carefully returns a first valid page from the given pfn range for the given zone. This doesn't handle zones which are not fully populated though. Memory pageblocks can be offlined or might not have been onlined yet. In such a case the zone should be considered to have holes otherwise pfn walkers can touch and play with offline pages. Current callers of pageblock_pfn_to_page in compaction seem to work properly right now because they only isolate PageBuddy (isolate_freepages_block) or PageLRU resp. __PageMovable (isolate_migratepages_block) which will be always false for these pages. It would be safer to skip these pages altogether, though. In order to do this patch adds a new memory section state (SECTION_IS_ONLINE) which is set in memory_present (during boot time) or in online_pages_range during the memory hotplug. Similarly offline_mem_sections clears the bit and it is called when the memory range is offlined. pfn_to_online_page helper is then added which check the mem section and only returns a page if it is onlined already. Use the new helper in __pageblock_pfn_to_page and skip the whole page block in such a case. [mhocko@suse.com: check valid section number in pfn_to_online_page (Vlastimil), mark sections online after all struct pages are initialized in online_pages_range (Vlastimil)] Link: http://lkml.kernel.org/r/20170518164210.GD18333@dhcp22.suse.cz Link: http://lkml.kernel.org/r/20170515085827.16474-8-mhocko@kernel.orgSigned-off-by:
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Michal Hocko authored
is_pageblock_removable_nolock() relies on having zone association to examine all the page blocks to check whether they are movable or free. This is just wasting of cycles when the memblock is offline. Later patch in the series will also change the time when the page is associated with a zone so we let's bail out early if the memblock is offline. Link: http://lkml.kernel.org/r/20170515085827.16474-7-mhocko@kernel.orgSigned-off-by:
Igor Mammedov <imammedo@redhat.com> Acked-by:
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Michal Hocko authored
Memory hotplug (add_memory_resource) has to reinitialize node infrastructure if the node is offline (one which went through the complete add_memory(); remove_memory() cycle). That involves node registration to the kobj infrastructure (register_node), the proper association with cpus (register_cpu_under_node) and finally creation of node<->memblock symlinks (link_mem_sections). The last part requires to know node_start_pfn and node_spanned_pages which we currently have but a leter patch will postpone this initialization to the onlining phase which happens later. In fact we do not need to rely on the early pgdat initialization even now because the currently hot added pfn range is currently known. Split register_one_node into core which does all the common work for the boot time NUMA initialization and the hotplug (__register_one_node). register_one_node keeps the full initialization while hotplug calls __register_one_node and manually calls link_mem_sections for the proper range. This shouldn't introduce any functional change. Link: http://lkml.kernel.org/r/20170515085827.16474-6-mhocko@kernel.orgSigned-off-by:
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Michal Hocko authored
Device memory hotplug hooks into regular memory hotplug only half way. It needs memory sections to track struct pages but there is no need/desire to associate those sections with memory blocks and export them to the userspace via sysfs because they cannot be onlined anyway. This is currently expressed by for_device argument to arch_add_memory which then makes sure to associate the given memory range with ZONE_DEVICE. register_new_memory then relies on is_zone_device_section to distinguish special memory hotplug from the regular one. While this works now, later patches in this series want to move __add_zone outside of arch_add_memory path so we have to come up with something else. Add want_memblock down the __add_pages path and use it to control whether the section->memblock association should be done. arch_add_memory then just trivially want memblock for everything but for_device hotplug. remove_memory_section doesn't need is_zone_device_section either. We can simply skip all the memblock specific cleanup if there is no memblock for the given section. This shouldn't introduce any functional change. Link: http://lkml.kernel.org/r/20170515085827.16474-5-mhocko@kernel.orgSigned-off-by:
Dan Williams <dan.j.williams@intel.com> Acked-by:
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Michal Hocko authored
Commit c04fc586 ("mm: show node to memory section relationship with symlinks in sysfs") has added means to export memblock<->node association into the sysfs. It has also introduced get_nid_for_pfn which is a rather confusing counterpart of pfn_to_nid which checks also whether the pfn page is already initialized (page_initialized). This is done by checking page::lru != NULL which doesn't make any sense at all. Nothing in this path really relies on the lru list being used or initialized. Just remove it because this will become a problem with later patches. Thanks to Reza Arbab for testing which revealed this to be a problem (http://lkml.kernel.org/r/20170403202337.GA12482@dhcp22.suse.cz) Link: http://lkml.kernel.org/r/20170515085827.16474-4-mhocko@kernel.orgSigned-off-by:
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Michal Hocko authored
The primary purpose of this helper is to query the node state so use the node id directly. This is a preparatory patch for later changes. This shouldn't introduce any functional change Link: http://lkml.kernel.org/r/20170515085827.16474-3-mhocko@kernel.orgSigned-off-by:
Yasuaki Ishimatsu <isimatu.yasuaki@jp.fujitsu.com> Acked-by:
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Michal Hocko authored
Patch series "mm: make movable onlining suck less", v4. Movable onlining is a real hack with many downsides - mainly reintroduction of lowmem/highmem issues we used to have on 32b systems - but it is the only way to make the memory hotremove more reliable which is something that people are asking for. The current semantic of memory movable onlinening is really cumbersome, however. The main reason for this is that the udev driven approach is basically unusable because udev races with the memory probing while only the last memory block or the one adjacent to the existing zone_movable are allowed to be onlined movable. In short the criterion for the successful online_movable changes under udev's feet. A reliable udev approach would require a 2 phase approach where the first successful movable online would have to check all the previous blocks and online them in descending order. This is hard to be considered sane. This patchset aims at making the onlining semantic more usable. First of all it allows to online memory movable as long as it doesn't clash with the existing ZONE_NORMAL. That means that ZONE_NORMAL and ZONE_MOVABLE cannot overlap. Currently I preserve the original ordering semantic so the zone always precedes the movable zone but I have plans to remove this restriction in future because it is not really necessary. First 3 patches are cleanups which should be ready to be merged right away (unless I have missed something subtle of course). Patch 4 deals with ZONE_DEVICE dependencies down the __add_pages path. Patch 5 deals with implicit assumptions of register_one_node on pgdat initialization. Patches 6-10 deal with offline holes in the zone for pfn walkers. I hope I got all of them right but people familiar with compaction should double check this. Patch 11 is the core of the change. In order to make it easier to review I have tried it to be as minimalistic as possible and the large code removal is moved to patch 14. Patch 12 is a trivial follow up cleanup. Patch 13 fixes sparse warnings and finally patch 14 removes the unused code. I have tested the patches in kvm: # qemu-system-x86_64 -enable-kvm -monitor pty -m 2G,slots=4,maxmem=4G -numa node,mem=1G -numa node,mem=1G ... and then probed the additional memory by (qemu) object_add memory-backend-ram,id=mem1,size=1G (qemu) device_add pc-dimm,id=dimm1,memdev=mem1 Then I have used this simple script to probe the memory block by hand # cat probe_memblock.sh #!/bin/sh BLOCK_NR=$1 # echo $((0x100000000+$BLOCK_NR*(128<<20))) > /sys/devices/system/memory/probe # for i in $(seq 10); do sh probe_memblock.sh $i; done # grep . /sys/devices/system/memory/memory3?/valid_zones 2>/dev/null /sys/devices/system/memory/memory33/valid_zones:Normal Movable /sys/devices/system/memory/memory34/valid_zones:Normal Movable /sys/devices/system/memory/memory35/valid_zones:Normal Movable /sys/devices/system/memory/memory36/valid_zones:Normal Movable /sys/devices/system/memory/memory37/valid_zones:Normal Movable /sys/devices/system/memory/memory38/valid_zones:Normal Movable /sys/devices/system/memory/memory39/valid_zones:Normal Movable The main difference to the original implementation is that all new memblocks can be both online_kernel and online_movable initially because there is no clash obviously. For the comparison the original implementation would have /sys/devices/system/memory/memory33/valid_zones:Normal /sys/devices/system/memory/memory34/valid_zones:Normal /sys/devices/system/memory/memory35/valid_zones:Normal /sys/devices/system/memory/memory36/valid_zones:Normal /sys/devices/system/memory/memory37/valid_zones:Normal /sys/devices/system/memory/memory38/valid_zones:Normal /sys/devices/system/memory/memory39/valid_zones:Normal Movable Now # echo online_movable > /sys/devices/system/memory/memory34/state # grep . /sys/devices/system/memory/memory3?/valid_zones 2>/dev/null /sys/devices/system/memory/memory33/valid_zones:Normal Movable /sys/devices/system/memory/memory34/valid_zones:Movable /sys/devices/system/memory/memory35/valid_zones:Movable /sys/devices/system/memory/memory36/valid_zones:Movable /sys/devices/system/memory/memory37/valid_zones:Movable /sys/devices/system/memory/memory38/valid_zones:Movable /sys/devices/system/memory/memory39/valid_zones:Movable Block 33 can still be online both kernel and movable while all the remaining can be only movable. /proc/zonelist says Node 0, zone Normal pages free 0 min 0 low 0 high 0 spanned 0 present 0 -- Node 0, zone Movable pages free 32753 min 85 low 117 high 149 spanned 32768 present 32768 A new memblock at a lower address will result in a new memblock (32) which will still allow both Normal and Movable. # sh probe_memblock.sh 0 # grep . /sys/devices/system/memory/memory3[2-5]/valid_zones 2>/dev/null /sys/devices/system/memory/memory32/valid_zones:Normal Movable /sys/devices/system/memory/memory33/valid_zones:Normal Movable /sys/devices/system/memory/memory34/valid_zones:Movable /sys/devices/system/memory/memory35/valid_zones:Movable and online_kernel will convert it to the zone normal properly while 33 can be still onlined both ways. # echo online_kernel > /sys/devices/system/memory/memory32/state # grep . /sys/devices/system/memory/memory3[2-5]/valid_zones 2>/dev/null /sys/devices/system/memory/memory32/valid_zones:Normal /sys/devices/system/memory/memory33/valid_zones:Normal Movable /sys/devices/system/memory/memory34/valid_zones:Movable /sys/devices/system/memory/memory35/valid_zones:Movable /proc/zoneinfo will now tell Node 0, zone Normal pages free 65441 min 165 low 230 high 295 spanned 65536 present 65536 -- Node 0, zone Movable pages free 32740 min 82 low 114 high 146 spanned 32768 present 32768 so both zones have one memblock spanned and present. Onlining 39 should associate this block to the movable zone # echo online > /sys/devices/system/memory/memory39/state /proc/zoneinfo will now tell Node 0, zone Normal pages free 32765 min 80 low 112 high 144 spanned 32768 present 32768 -- Node 0, zone Movable pages free 65501 min 160 low 225 high 290 spanned 196608 present 65536 so we will have a movable zone which spans 6 memblocks, 2 present and 4 representing a hole. Offlining both movable blocks will lead to the zone with no present pages which is the expected behavior I believe. # echo offline > /sys/devices/system/memory/memory39/state # echo offline > /sys/devices/system/memory/memory34/state # grep -A6 "Movable\|Normal" /proc/zoneinfo Node 0, zone Normal pages free 32735 min 90 low 122 high 154 spanned 32768 present 32768 -- Node 0, zone Movable pages free 0 min 0 low 0 high 0 spanned 196608 present 0 As a bonus we will get a nice cleanup in the memory hotplug codebase. This patch (of 16): init_currently_empty_zone doesn't have any error to return yet it is still an int and callers try to be defensive and try to handle potential error. Remove this nonsense and simplify all callers. This patch shouldn't have any visible effect Link: http://lkml.kernel.org/r/20170515085827.16474-2-mhocko@kernel.orgSigned-off-by:Balbir Singh <bsingharora@gmail.com> Acked-by:
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Huang Ying authored
If there is no compound map for a THP (Transparent Huge Page), it is possible that the map count of some sub-pages of the THP is 0. So it is better to split the THP before swapping out. In this way, the sub-pages not mapped will be freed, and we can avoid the unnecessary swap out operations for these sub-pages. Link: http://lkml.kernel.org/r/20170515112522.32457-6-ying.huang@intel.comSigned-off-by:
"Huang, Ying" <ying.huang@intel.com> Cc: Johannes Weiner <hannes@cmpxchg.org> Cc: Andrea Arcangeli <aarcange@redhat.com> Cc: Ebru Akagunduz <ebru.akagunduz@gmail.com> Cc: Hugh Dickins <hughd@google.com> Cc: Kirill A. Shutemov <kirill.shutemov@linux.intel.com> Cc: Michal Hocko <mhocko@kernel.org> Cc: Minchan Kim <minchan@kernel.org> Cc: Rik van Riel <riel@redhat.com> Cc: Shaohua Li <shli@kernel.org> Cc: Tejun Heo <tj@kernel.org> Signed-off-by:
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Huang Ying authored
To swap out THP (Transparent Huage Page), before splitting the THP, the swap cluster will be allocated and the THP will be added into the swap cache. But it is possible that the THP cannot be split, so that we must delete the THP from the swap cache and free the swap cluster. To avoid that, in this patch, whether the THP can be split is checked firstly. The check can only be done racy, but it is good enough for most cases. With the patch, the swap out throughput improves 3.6% (from about 4.16GB/s to about 4.31GB/s) in the vm-scalability swap-w-seq test case with 8 processes. The test is done on a Xeon E5 v3 system. The swap device used is a RAM simulated PMEM (persistent memory) device. To test the sequential swapping out, the test case creates 8 processes, which sequentially allocate and write to the anonymous pages until the RAM and part of the swap device is used up. Link: http://lkml.kernel.org/r/20170515112522.32457-5-ying.huang@intel.comSigned-off-by:
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Minchan Kim authored
The add_to_swap aims to allocate swap_space(ie, swap slot and swapcache) so if it fails due to lack of space in case of THP or something(hdd swap but tries THP swapout) *caller* rather than add_to_swap itself should split the THP page and retry it with base page which is more natural. Link: http://lkml.kernel.org/r/20170515112522.32457-4-ying.huang@intel.comSigned-off-by:
Minchan Kim <minchan@kernel.org> Signed-off-by:
Johannes Weiner <hannes@cmpxchg.org> Cc: Andrea Arcangeli <aarcange@redhat.com> Cc: Ebru Akagunduz <ebru.akagunduz@gmail.com> Cc: Hugh Dickins <hughd@google.com> Cc: Kirill A. Shutemov <kirill.shutemov@linux.intel.com> Cc: Michal Hocko <mhocko@kernel.org> Cc: Rik van Riel <riel@redhat.com> Cc: Shaohua Li <shli@kernel.org> Cc: Tejun Heo <tj@kernel.org> Signed-off-by:
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Minchan Kim authored
Now, get_swap_page takes struct page and allocates swap space according to page size(ie, normal or THP) so it would be more cleaner to introduce put_swap_page which is a counter function of get_swap_page. Then, it calls right swap slot free function depending on page's size. [ying.huang@intel.com: minor cleanup and fix] Link: http://lkml.kernel.org/r/20170515112522.32457-3-ying.huang@intel.comSigned-off-by:
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Huang Ying authored
Patch series "THP swap: Delay splitting THP during swapping out", v11. This patchset is to optimize the performance of Transparent Huge Page (THP) swap. Recently, the performance of the storage devices improved so fast that we cannot saturate the disk bandwidth with single logical CPU when do page swap out even on a high-end server machine. Because the performance of the storage device improved faster than that of single logical CPU. And it seems that the trend will not change in the near future. On the other hand, the THP becomes more and more popular because of increased memory size. So it becomes necessary to optimize THP swap performance. The advantages of the THP swap support include: - Batch the swap operations for the THP to reduce lock acquiring/releasing, including allocating/freeing the swap space, adding/deleting to/from the swap cache, and writing/reading the swap space, etc. This will help improve the performance of the THP swap. - The THP swap space read/write will be 2M sequential IO. It is particularly helpful for the swap read, which are usually 4k random IO. This will improve the performance of the THP swap too. - It will help the memory fragmentation, especially when the THP is heavily used by the applications. The 2M continuous pages will be free up after THP swapping out. - It will improve the THP utilization on the system with the swap turned on. Because the speed for khugepaged to collapse the normal pages into the THP is quite slow. After the THP is split during the swapping out, it will take quite long time for the normal pages to collapse back into the THP after being swapped in. The high THP utilization helps the efficiency of the page based memory management too. There are some concerns regarding THP swap in, mainly because possible enlarged read/write IO size (for swap in/out) may put more overhead on the storage device. To deal with that, the THP swap in should be turned on only when necessary. For example, it can be selected via "always/never/madvise" logic, to be turned on globally, turned off globally, or turned on only for VMA with MADV_HUGEPAGE, etc. This patchset is the first step for the THP swap support. The plan is to delay splitting THP step by step, finally avoid splitting THP during the THP swapping out and swap out/in the THP as a whole. As the first step, in this patchset, the splitting huge page is delayed from almost the first step of swapping out to after allocating the swap space for the THP and adding the THP into the swap cache. This will reduce lock acquiring/releasing for the locks used for the swap cache management. With the patchset, the swap out throughput improves 15.5% (from about 3.73GB/s to about 4.31GB/s) in the vm-scalability swap-w-seq test case with 8 processes. The test is done on a Xeon E5 v3 system. The swap device used is a RAM simulated PMEM (persistent memory) device. To test the sequential swapping out, the test case creates 8 processes, which sequentially allocate and write to the anonymous pages until the RAM and part of the swap device is used up. This patch (of 5): In this patch, splitting huge page is delayed from almost the first step of swapping out to after allocating the swap space for the THP (Transparent Huge Page) and adding the THP into the swap cache. This will batch the corresponding operation, thus improve THP swap out throughput. This is the first step for the THP swap optimization. The plan is to delay splitting the THP step by step and avoid splitting the THP finally. In this patch, one swap cluster is used to hold the contents of each THP swapped out. So, the size of the swap cluster is changed to that of the THP (Transparent Huge Page) on x86_64 architecture (512). For other architectures which want such THP swap optimization, ARCH_USES_THP_SWAP_CLUSTER needs to be selected in the Kconfig file for the architecture. In effect, this will enlarge swap cluster size by 2 times on x86_64. Which may make it harder to find a free cluster when the swap space becomes fragmented. So that, this may reduce the continuous swap space allocation and sequential write in theory. The performance test in 0day shows no regressions caused by this. In the future of THP swap optimization, some information of the swapped out THP (such as compound map count) will be recorded in the swap_cluster_info data structure. The mem cgroup swap accounting functions are enhanced to support charge or uncharge a swap cluster backing a THP as a whole. The swap cluster allocate/free functions are added to allocate/free a swap cluster for a THP. A fair simple algorithm is used for swap cluster allocation, that is, only the first swap device in priority list will be tried to allocate the swap cluster. The function will fail if the trying is not successful, and the caller will fallback to allocate a single swap slot instead. This works good enough for normal cases. If the difference of the number of the free swap clusters among multiple swap devices is significant, it is possible that some THPs are split earlier than necessary. For example, this could be caused by big size difference among multiple swap devices. The swap cache functions is enhanced to support add/delete THP to/from the swap cache as a set of (HPAGE_PMD_NR) sub-pages. This may be enhanced in the future with multi-order radix tree. But because we will split the THP soon during swapping out, that optimization doesn't make much sense for this first step. The THP splitting functions are enhanced to support to split THP in swap cache during swapping out. The page lock will be held during allocating the swap cluster, adding the THP into the swap cache and splitting the THP. So in the code path other than swapping out, if the THP need to be split, the PageSwapCache(THP) will be always false. The swap cluster is only available for SSD, so the THP swap optimization in this patchset has no effect for HDD. [ying.huang@intel.com: fix two issues in THP optimize patch] Link: http://lkml.kernel.org/r/87k25ed8zo.fsf@yhuang-dev.intel.com [hannes@cmpxchg.org: extensive cleanups and simplifications, reduce code size] Link: http://lkml.kernel.org/r/20170515112522.32457-2-ying.huang@intel.comSigned-off-by:
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Anshuman Khandual authored
Standardize the file operation variable names related to all four memory management /proc interface files. Also change all the symbol permissions (S_IRUGO) into octal permissions (0444) as it got complaints from checkpatch.pl. This does not create any functional change to the interface. Link: http://lkml.kernel.org/r/20170427030632.8588-1-khandual@linux.vnet.ibm.comSigned-off-by:
Anshuman Khandual <khandual@linux.vnet.ibm.com> Signed-off-by:
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Minchan Kim authored
Regardless of whether it is same page or not, it's surely write and stored to zram so we should increase pages_stored stat. Otherwise, user can see zero value via mm_stats although he writes a lot of pages to zram. Link: http://lkml.kernel.org/r/1494834068-27004-1-git-send-email-minchan@kernel.orgSigned-off-by:
Sergey Senozhatsky <sergey.senozhatsky@gmail.com> Cc: Joonsoo Kim <iamjoonsoo.kim@lge.com> Signed-off-by:
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Andrea Arcangeli authored
If a candidate stable_node_dup has been found and it can accept further merges it can be refiled to the head of the list to speedup next searches without altering which dup is found and how the dups accumulate in the chain. We already refiled it back to the head in the prune_stale_stable_nodes case, but we didn't refile it if not pruning (which is more common). And we also refiled it when it was already at the head which is unnecessary (in the prune_stale_stable_nodes case, nr > 1 means there's more than one dup in the chain, it doesn't mean it's not already at the head of the chain). The stable_node_chain list is single threaded and there's no SMP locking contention so it should be faster to refile it to the head of the list also if prune_stale_stable_nodes is false. Profiling shows the refile happens 1.9% of the time when a dup is found with a max_page_sharing limit setting of 3 (with max_page_sharing of 2 the refile never happens of course as there's never space for one more merge) which is reasonably low. At higher max_page_sharing values it should be much less frequent. This is just an optimization. Link: http://lkml.kernel.org/r/20170518173721.22316-4-aarcange@redhat.comSigned-off-by:
Andrea Arcangeli <aarcange@redhat.com> Cc: Evgheni Dereveanchin <ederevea@redhat.com> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Cc: Petr Holasek <pholasek@redhat.com> Cc: Hugh Dickins <hughd@google.com> Cc: Arjan van de Ven <arjan@linux.intel.com> Cc: Davidlohr Bueso <dave@stgolabs.net> Cc: Gavin Guo <gavin.guo@canonical.com> Cc: Jay Vosburgh <jay.vosburgh@canonical.com> Cc: Mel Gorman <mgorman@techsingularity.net> Cc: Dan Carpenter <dan.carpenter@oracle.com> Signed-off-by:
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Andrea Arcangeli authored
Some static checker complains if chain/chain_prune returns a potentially stale pointer. There are two output parameters to chain/chain_prune, one is tree_page the other is stable_node_dup. Like in get_ksm_page the caller has to check tree_page is NULL before touching the stable_node. Similarly in chain/chain_prune the caller has to check tree_page before touching the stable_node_dup returned or the original stable_node passed as parameter. Because the tree_page is never returned as a stale pointer, it may be more intuitive to return tree_page and to pass stable_node_dup for reference instead of the reverse. This patch purely swaps the two output parameters of chain/chain_prune as a cleanup for the static checker and to mimic the get_ksm_page behavior more closely. There's no change to the caller at all except the swap, it's purely a cleanup and it is a noop from the caller point of view. Link: http://lkml.kernel.org/r/20170518173721.22316-3-aarcange@redhat.comSigned-off-by:
Dan Carpenter <dan.carpenter@oracle.com> Tested-by:
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Andrea Arcangeli authored
Patch series "KSMscale cleanup/optimizations". There are no fixes here it's just minor cleanups and optimizations. 1/3 removes makes the "fix" for the stale stable_node fall in the standard case without introducing new cases. Setting stable_node to NULL was marginally safer, but stale pointer is still wiped from the caller, this looks cleaner. 2/3 should fix the false positive from Dan's static checker. 3/3 is a microoptimization to apply the the refile of future merge candidate dups at the head of the chain in all cases and to skip it in one case where we did it and but it was a noop (to avoid checking if it was already at the head but now we've to check it anyway so it got optimized away). This patch (of 3): When the stable_node chain is collapsed we can as well set the caller stable_node to match the returned stable_node_dup in chain_prune(). This way the collapse case becomes indistinguishable from the regular stable_node case and we can remove two branches from the KSM page migration handling slow paths. While it was all correct this looks cleaner (and faster) as the caller has to deal with fewer special cases. Link: http://lkml.kernel.org/r/20170518173721.22316-2-aarcange@redhat.comSigned-off-by: -
Andrea Arcangeli authored
If merge_across_nodes was manually set to 0 (not the default value) by the admin or a tuned profile on NUMA systems triggering cross-NODE page migrations, a stable_node use after free could materialize. If the chain is collapsed stable_node would point to the old chain that was already freed. stable_node_dup would be the stable_node dup now converted to a regular stable_node and indexed in the rbtree in replacement of the freed stable_node chain (not anymore a dup). This special case where the chain is collapsed in the NUMA replacement path, is now detected by setting stable_node to NULL by the chain_prune callee if it decides to collapse the chain. This tells the NUMA replacement code that even if stable_node and stable_node_dup are different, this is not a chain if stable_node is NULL, as the stable_node_dup was converted to a regular stable_node and the chain was collapsed. It is generally safer for the callee to force the caller stable_node to NULL the moment it become stale so any other mistake like this would result in an instant Oops easier to debug than an use after free. Otherwise the replace logic would act like if stable_node was a valid chain, when in fact it was freed. Notably stable_node_chain_add_dup(page_node, stable_node) would run on a stable stable_node. Andrey Ryabinin found the source of the use after free in chain_prune(). Link: http://lkml.kernel.org/r/20170512193805.8807-2-aarcange@redhat.comSigned-off-by:
Andrey Ryabinin <aryabinin@virtuozzo.com> Reported-by:
Evgheni Dereveanchin <ederevea@redhat.com> Tested-by:
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Andrea Arcangeli authored
Without a max deduplication limit for each KSM page, the list of the rmap_items associated to each stable_node can grow infinitely large. During the rmap walk each entry can take up to ~10usec to process because of IPIs for the TLB flushing (both for the primary MMU and the secondary MMUs with the MMU notifier). With only 16GB of address space shared in the same KSM page, that would amount to dozens of seconds of kernel runtime. A ~256 max deduplication factor will reduce the latencies of the rmap walks on KSM pages to order of a few msec. Just doing the cond_resched() during the rmap walks is not enough, the list size must have a limit too, otherwise the caller could get blocked in (schedule friendly) kernel computations for seconds, unexpectedly. There's room for optimization to significantly reduce the IPI delivery cost during the page_referenced(), but at least for page_migration in the KSM case (used by hard NUMA bindings, compaction and NUMA balancing) it may be inevitable to send lots of IPIs if each rmap_item->mm is active on a different CPU and there are lots of CPUs. Even if we ignore the IPI delivery cost, we've still to walk the whole KSM rmap list, so we can't allow millions or billions (ulimited) number of entries in the KSM stable_node rmap_item lists. The limit is enforced efficiently by adding a second dimension to the stable rbtree. So there are three types of stable_nodes: the regular ones (identical as before, living in the first flat dimension of the stable rbtree), the "chains" and the "dups". Every "chain" and all "dups" linked into a "chain" enforce the invariant that they represent the same write protected memory content, even if each "dup" will be pointed by a different KSM page copy of that content. This way the stable rbtree lookup computational complexity is unaffected if compared to an unlimited max_sharing_limit. It is still enforced that there cannot be KSM page content duplicates in the stable rbtree itself. Adding the second dimension to the stable rbtree only after the max_page_sharing limit hits, provides for a zero memory footprint increase on 64bit archs. The memory overhead of the per-KSM page stable_tree and per virtual mapping rmap_item is unchanged. Only after the max_page_sharing limit hits, we need to allocate a stable_tree "chain" and rb_replace() the "regular" stable_node with the newly allocated stable_node "chain". After that we simply add the "regular" stable_node to the chain as a stable_node "dup" by linking hlist_dup in the stable_node_chain->hlist. This way the "regular" (flat) stable_node is converted to a stable_node "dup" living in the second dimension of the stable rbtree. During stable rbtree lookups the stable_node "chain" is identified as stable_node->rmap_hlist_len == STABLE_NODE_CHAIN (aka is_stable_node_chain()). When dropping stable_nodes, the stable_node "dup" is identified as stable_node->head == STABLE_NODE_DUP_HEAD (aka is_stable_node_dup()). The STABLE_NODE_DUP_HEAD must be an unique valid pointer never used elsewhere in any stable_node->head/node to avoid a clashes with the stable_node->node.rb_parent_color pointer, and different from &migrate_nodes. So the second field of &migrate_nodes is picked and verified as always safe with a BUILD_BUG_ON in case the list_head implementation changes in the future. The STABLE_NODE_DUP is picked as a random negative value in stable_node->rmap_hlist_len. rmap_hlist_len cannot become negative when it's a "regular" stable_node or a stable_node "dup". The stable_node_chain->nid is irrelevant. The stable_node_chain->kpfn is aliased in a union with a time field used to rate limit the stable_node_chain->hlist prunes. The garbage collection of the stable_node_chain happens lazily during stable rbtree lookups (as for all other kind of stable_nodes), or while disabling KSM with "echo 2 >/sys/kernel/mm/ksm/run" while collecting the entire stable rbtree. While the "regular" stable_nodes and the stable_node "dups" must wait for their underlying tree_page to be freed before they can be freed themselves, the stable_node "chains" can be freed immediately if the stable_node->hlist turns empty. This is because the "chains" are never pointed by any page->mapping and they're effectively stable rbtree KSM self contained metadata. [akpm@linux-foundation.org: fix non-NUMA build] Signed-off-by:
Petr Holasek <pholasek@redhat.com> Cc: Hugh Dickins <hughd@google.com> Cc: Davidlohr Bueso <dave@stgolabs.net> Cc: Arjan van de Ven <arjan@linux.intel.com> Cc: Evgheni Dereveanchin <ederevea@redhat.com> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Cc: Gavin Guo <gavin.guo@canonical.com> Cc: Jay Vosburgh <jay.vosburgh@canonical.com> Cc: Mel Gorman <mgorman@techsingularity.net> Signed-off-by:
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Wei Yang authored
When start_pfn equals end_pfn, __free_pages_memory() has no effect and __free_memory_core() will finally return (end_pfn - start_pfn) = 0. This patch returns 0 directly when start_pfn equals end_pfn. Link: http://lkml.kernel.org/r/20170502131115.6650-1-richard.weiyang@gmail.comSigned-off-by:
Wei Yang <richard.weiyang@gmail.com> Signed-off-by:
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Nick Desaulniers authored
Clang and its -Wunsequenced emits a warning mm/vmscan.c:2961:25: error: unsequenced modification and access to 'gfp_mask' [-Wunsequenced] .gfp_mask = (gfp_mask = current_gfp_context(gfp_mask)), ^ While it is not clear to me whether the initialization code violates the specification (6.7.8 par 19 (ISO/IEC 9899) looks like it disagrees) the code is quite confusing and worth cleaning up anyway. Fix this by reusing sc.gfp_mask rather than the updated input gfp_mask parameter. Link: http://lkml.kernel.org/r/20170510154030.10720-1-nick.desaulniers@gmail.comSigned-off-by:Nick Desaulniers <nick.desaulniers@gmail.com> Acked-by:
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Daniel Micay authored
The protection map is only modified by per-arch init code so it can be protected from writes after the init code runs. This change was extracted from PaX where it's part of KERNEXEC. Link: http://lkml.kernel.org/r/20170510174441.26163-1-danielmicay@gmail.comSigned-off-by:
Daniel Micay <danielmicay@gmail.com> Acked-by:
Kees Cook <keescook@chromium.org> Signed-off-by:
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Dave Hansen authored
There are a number of times that we loop over NR_MEM_SECTIONS, looking for section_present() on each section. But, when we have very large physical address spaces (large MAX_PHYSMEM_BITS), NR_MEM_SECTIONS becomes very large, making the loops quite long. With MAX_PHYSMEM_BITS=46 and a section size of 128MB, the current loops are 512k iterations, which we barely notice on modern hardware. But, raising MAX_PHYSMEM_BITS higher (like we will see on systems that support 5-level paging) makes this 64x longer and we start to notice, especially on slower systems like simulators. A 10-second delay for 512k iterations is annoying. But, a 640- second delay is crippling. This does not help if we have extremely sparse physical address spaces, but those are quite rare. We expect that most of the "slow" systems where this matters will also be quite small and non-sparse. To fix this, we track the highest section we've ever encountered. This lets us know when we will *never* see another section_present(), and lets us break out of the loops earlier. Doing the whole for_each_present_section_nr() macro is probably overkill, but it will ensure that any future loop iterations that we grow are more likely to be correct. Kirrill said "It shaved almost 40 seconds from boot time in qemu with 5-level paging enabled for me". Link: http://lkml.kernel.org/r/20170504174434.C45A4735@viggo.jf.intel.comSigned-off-by:
Dave Hansen <dave.hansen@linux.intel.com> Tested-by:
Kirill A. Shutemov <kirill.shutemov@linux.intel.com> Signed-off-by:
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Kees Cook authored
Some hardened environments want to build kernels with slab_nomerge already set (so that they do not depend on remembering to set the kernel command line option). This is desired to reduce the risk of kernel heap overflows being able to overwrite objects from merged caches and changes the requirements for cache layout control, increasing the difficulty of these attacks. By keeping caches unmerged, these kinds of exploits can usually only damage objects in the same cache (though the risk to metadata exploitation is unchanged). Link: http://lkml.kernel.org/r/20170620230911.GA25238@beastSigned-off-by:
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Canjiang Lu authored
Link: http://lkml.kernel.org/r/20170616072918epcms5p4ff16c24ef8472b4c3b4371823cd87856@epcms5p4Signed-off-by:
Canjiang Lu <canjiang.lu@samsung.com> Cc: Christoph Lameter <cl@linux.com> Cc: Pekka Enberg <penberg@kernel.org> Cc: David Rientjes <rientjes@google.com> Cc: Joonsoo Kim <iamjoonsoo.kim@lge.com> Signed-off-by:
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Wei Yang authored
kmem_cache->cpu_partial is just used when CONFIG_SLUB_CPU_PARTIAL is set, so wrap it with config CONFIG_SLUB_CPU_PARTIAL will save some space on 32bit arch. This patch wraps kmem_cache->cpu_partial in config CONFIG_SLUB_CPU_PARTIAL and wraps its sysfs too. Link: http://lkml.kernel.org/r/20170502144533.10729-4-richard.weiyang@gmail.comSigned-off-by:
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Wei Yang authored
cpu_slab's field partial is used when CONFIG_SLUB_CPU_PARTIAL is set, which means we can save a pointer's space on each cpu for every slub item. This patch wraps cpu_slab->partial in CONFIG_SLUB_CPU_PARTIAL and wraps its sysfs use too. [akpm@linux-foundation.org: avoid strange 80-col tricks] Link: http://lkml.kernel.org/r/20170502144533.10729-3-richard.weiyang@gmail.comSigned-off-by:
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Wei Yang authored
Patch series "try to save some memory for kmem_cache in some cases", v2. kmem_cache is a frequently used data in kernel. During the code reading, I found maybe we could save some space in some cases. 1. On 64bit arch, type int will occupy a word if it doesn't sit well. 2. cpu_slab->partial is just used when CONFIG_SLUB_CPU_PARTIAL is set 3. cpu_partial is just used when CONFIG_SLUB_CPU_PARTIAL is set, while just save some space on 32bit arch. This patch (of 3): On 64bit arch, struct is 8-bytes aligned, so int will occupy a word if it doesn't sit well. This patch pack red_left_pad with reserved to save 8 bytes for struct kmem_cache on a 64bit arch. Link: http://lkml.kernel.org/r/20170502144533.10729-2-richard.weiyang@gmail.comSigned-off-by:
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Wei Yang authored
Each time a slab is deactivated, the page and freelist pointer should be reset. This patch just merges these two options into deactivate_slab(). Link: http://lkml.kernel.org/r/20170507031215.3130-2-richard.weiyang@gmail.comSigned-off-by:
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Wei Yang authored
When the code comes to this point, there are two cases: 1. cpu_slab is deactivated 2. cpu_slab is empty In both cased, cpu_slab->freelist is NULL at this moment. This patch removes the redundant assignment of cpu_slab->freelist. Link: http://lkml.kernel.org/r/20170507031215.3130-1-richard.weiyang@gmail.comSigned-off-by:
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Michal Hocko authored
There is no real reason to duplicate kvmalloc* helpers so drop alloc_fdmem and replace it with the appropriate library function. Link: http://lkml.kernel.org/r/20170531155145.17111-2-mhocko@kernel.orgSigned-off-by:
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Arvind Yadav authored
attribute_groups are not supposed to change at runtime. All functions working with attribute_groups provided by <linux/sysfs.h> work with const attribute_group. So mark the non-const structs as const. File size before: text data bss dec hex filename 4402 1088 38 5528 1598 fs/ocfs2/stackglue.o File size After adding 'const': text data bss dec hex filename 4442 1024 38 5504 1580 fs/ocfs2/stackglue.o Link: http://lkml.kernel.org/r/cab4e59b4918db3ed2ec77073a4cb310c4429ef5.1498808026.git.arvind.yadav.cs@gmail.comSigned-off-by:
Arvind Yadav <arvind.yadav.cs@gmail.com> Cc: Mark Fasheh <mfasheh@versity.com> Cc: Joel Becker <jlbec@evilplan.org> Cc: Junxiao Bi <junxiao.bi@oracle.com> Cc: Joseph Qi <jiangqi903@gmail.com> Signed-off-by:
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piaojun authored
'sd->dbg_sock' is malloced in sc_common_open(), but not freed at the end of sc_fop_release(). Link: http://lkml.kernel.org/r/594FB0A4.2050105@huawei.comSigned-off-by:
Jun Piao <piaojun@huawei.com> Reviewed-by:
Joseph Qi <jiangqi903@gmail.com> Cc: Mark Fasheh <mfasheh@versity.com> Cc: Joel Becker <jlbec@evilplan.org> Cc: Junxiao Bi <junxiao.bi@oracle.com> Signed-off-by:
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Fabian Frederick authored
Filesystems generally use SUPER_MAGIC values from magic.h instead of a local definition. Link: http://lkml.kernel.org/r/20170521154217.27917-1-fabf@skynet.beSigned-off-by:
Fabian Frederick <fabf@skynet.be> Reviewed-by:
Mark Fasheh <mfasheh@versity.com> Cc: Joel Becker <jlbec@evilplan.org> Cc: Junxiao Bi <junxiao.bi@oracle.com> Cc: Joseph Qi <jiangqi903@gmail.com> Signed-off-by:
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Gang He authored
Fix a static code checker warning: fs/ocfs2/inode.c:179 ocfs2_iget() warn: passing zero to 'ERR_PTR' Fixes: d56a8f32 ("ocfs2: check/fix inode block for online file check") Link: http://lkml.kernel.org/r/1495516634-1952-1-git-send-email-ghe@suse.comSigned-off-by:
Gang He <ghe@suse.com> Reviewed-by:
Eric Ren <zren@suse.com> Cc: Mark Fasheh <mfasheh@versity.com> Cc: Joel Becker <jlbec@evilplan.org> Cc: Junxiao Bi <junxiao.bi@oracle.com> Signed-off-by:
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SF Markus Elfring authored
drivers/sh/intc/virq.c: delete an error message for a failed memory allocation in add_virq_to_pirq() This issue was detected by using the Coccinelle software. Link: http://events.linuxfoundation.org/sites/events/files/slides/LCJ16-Refactor_Strings-WSang_0.pdf Link: http://lkml.kernel.org/r/54e30d61-5183-9911-cf35-1410fb78da5a@users.sourceforge.netSigned-off-by:
Markus Elfring <elfring@users.sourceforge.net> Signed-off-by:
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Michael Ellerman authored
This header always exists, so doesn't require an ifdef around its inclusion. When CONFIG_ARCH_HAS_SET_MEMORY=y it includes the asm header, otherwise it provides empty versions of the set_memory_xx() routines. Link: http://lkml.kernel.org/r/1498717781-29151-4-git-send-email-mpe@ellerman.id.auSigned-off-by:
Michael Ellerman <mpe@ellerman.id.au> Acked-by:
Daniel Borkmann <daniel@iogearbox.net> Acked-by:
Laura Abbott <labbott@redhat.com> Signed-off-by:
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Michael Ellerman authored
This header always exists, so doesn't require an ifdef around its inclusion. When CONFIG_ARCH_HAS_SET_MEMORY=y it includes the asm header, otherwise it provides empty versions of the set_memory_xx() routines. The usages of set_memory_xx() are still guarded by CONFIG_STRICT_MODULE_RWX. Link: http://lkml.kernel.org/r/1498717781-29151-3-git-send-email-mpe@ellerman.id.auSigned-off-by:
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