- 20 May, 2016 40 commits
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Vaishali Thakkar authored
Update setup_hugepagesz() to call hugetlb_bad_size() when unsupported hugepage size is found. Signed-off-by:
Vaishali Thakkar <vaishali.thakkar@oracle.com> Reviewed-by:
Mike Kravetz <mike.kravetz@oracle.com> Reviewed-by:
Naoya Horiguchi <n-horiguchi@ah.jp.nec.com> Acked-by:
Michal Hocko <mhocko@suse.com> Cc: Hillf Danton <hillf.zj@alibaba-inc.com> Cc: Yaowei Bai <baiyaowei@cmss.chinamobile.com> Cc: Dominik Dingel <dingel@linux.vnet.ibm.com> Cc: Kirill A. Shutemov <kirill.shutemov@linux.intel.com> Cc: Paul Gortmaker <paul.gortmaker@windriver.com> Cc: Dave Hansen <dave.hansen@linux.intel.com> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Signed-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Vaishali Thakkar authored
Update setup_hugepagesz() to call hugetlb_bad_size() when unsupported hugepage size is found. Signed-off-by:
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Vaishali Thakkar authored
When any unsupported hugepage size is specified, 'hugepagesz=' and 'hugepages=' should be ignored during command line parsing until any supported hugepage size is found. But currently incorrect number of hugepages are allocated when unsupported size is specified as it fails to ignore the 'hugepages=' command. Test case: Note that this is specific to x86 architecture. Boot the kernel with command line option 'hugepagesz=256M hugepages=X'. After boot, dmesg output shows that X number of hugepages of the size 2M is pre-allocated instead of 0. So, to handle such command line options, introduce new routine hugetlb_bad_size. The routine hugetlb_bad_size sets the global variable parsed_valid_hugepagesz. We are using parsed_valid_hugepagesz to save the state when unsupported hugepagesize is found so that we can ignore the 'hugepages=' parameters after that and then reset the variable when supported hugepage size is found. The routine hugetlb_bad_size can be called while setting 'hugepagesz=' parameter in an architecture specific code. Signed-off-by:
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Mike Kravetz authored
It was observed that minimum size accounting associated with the hugetlbfs min_size mount option may not perform optimally and as expected. As huge pages/reservations are released from the filesystem and given back to the global pools, they are reserved for subsequent filesystem use as long as the subpool reserved count is less than subpool minimum size. It does not take into account used pages within the filesystem. The filesystem size limits are not exceeded and this is technically not a bug. However, better behavior would be to wait for the number of used pages/reservations associated with the filesystem to drop below the minimum size before taking reservations to satisfy minimum size. An optimization is also made to the hugepage_subpool_get_pages() routine which is called when pages/reservations are allocated. This does not change behavior, but simply avoids the accounting if all reservations have already been taken (subpool reserved count == 0). Signed-off-by:
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Andrew Morton authored
Lots of code does node = next_node(node, XXX); if (node == MAX_NUMNODES) node = first_node(XXX); so create next_node_in() to do this and use it in various places. [mhocko@suse.com: use next_node_in() helper] Acked-by:
Vlastimil Babka <vbabka@suse.cz> Acked-by:
Michal Hocko <mhocko@kernel.org> Signed-off-by:
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Rasmus Villemoes authored
Attach the malloc attribute to a few allocation functions. This helps gcc generate better code by telling it that the return value doesn't alias any existing pointers (which is even more valuable given the pessimizations implied by -fno-strict-aliasing). A simple example of what this allows gcc to do can be seen by looking at the last part of drm_atomic_helper_plane_reset: plane->state = kzalloc(sizeof(*plane->state), GFP_KERNEL); if (plane->state) { plane->state->plane = plane; plane->state->rotation = BIT(DRM_ROTATE_0); } which compiles to e8 99 bf d6 ff callq ffffffff8116d540 <kmem_cache_alloc_trace> 48 85 c0 test %rax,%rax 48 89 83 40 02 00 00 mov %rax,0x240(%rbx) 74 11 je ffffffff814015c4 <drm_atomic_helper_plane_reset+0x64> 48 89 18 mov %rbx,(%rax) 48 8b 83 40 02 00 00 mov 0x240(%rbx),%rax [*] c7 40 40 01 00 00 00 movl $0x1,0x40(%rax) With this patch applied, the instruction at [*] is elided, since the store to plane->state->plane is known to not alter the value of plane->state. [akpm@linux-foundation.org: coding-style fixes] Signed-off-by:Rasmus Villemoes <linux@rasmusvillemoes.dk> 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> Cc: Andi Kleen <ak@linux.intel.com> Signed-off-by:
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Rasmus Villemoes authored
gcc as far back as at least 3.04 documents the function attribute __malloc__. Add a shorthand for attaching that to a function declaration. This was also suggested by Andi Kleen way back in 2002 [1], but didn't get applied, perhaps because gcc at that time generated the exact same code with and without this attribute. This attribute tells the compiler that the return value (if non-NULL) can be assumed not to alias any other valid pointers at the time of the call. Please note that the documentation for a range of gcc versions (starting from around 4.7) contained a somewhat confusing and self-contradicting text: The malloc attribute is used to tell the compiler that a function may be treated as if any non-NULL pointer it returns cannot alias any other pointer valid when the function returns and *that the memory has undefined content*. [...] Standard functions with this property include malloc and *calloc*. (emphasis mine). The intended meaning has later been clarified [2]: This tells the compiler that a function is malloc-like, i.e., that the pointer P returned by the function cannot alias any other pointer valid when the function returns, and moreover no pointers to valid objects occur in any storage addressed by P. What this means is that we can apply the attribute to kmalloc and friends, and it is ok for the returned memory to have well-defined contents (__GFP_ZERO). But it is not ok to apply it to kmemdup(), nor to other functions which both allocate and possibly initialize the memory with existing pointers. So unless someone is doing something pretty perverted kstrdup() should also be a fine candidate. [1] http://thread.gmane.org/gmane.linux.kernel/57172 [2] https://gcc.gnu.org/bugzilla/show_bug.cgi?id=56955Signed-off-by:
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Joonsoo Kim authored
Many developers already know that field for reference count of the struct page is _count and atomic type. They would try to handle it directly and this could break the purpose of page reference count tracepoint. To prevent direct _count modification, this patch rename it to _refcount and add warning message on the code. After that, developer who need to handle reference count will find that field should not be accessed directly. [akpm@linux-foundation.org: fix comments, per Vlastimil] [akpm@linux-foundation.org: Documentation/vm/transhuge.txt too] [sfr@canb.auug.org.au: sync ethernet driver changes] Signed-off-by:
Joonsoo Kim <iamjoonsoo.kim@lge.com> Signed-off-by:
Stephen Rothwell <sfr@canb.auug.org.au> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Hugh Dickins <hughd@google.com> Cc: Johannes Berg <johannes@sipsolutions.net> Cc: "David S. Miller" <davem@davemloft.net> Cc: Sunil Goutham <sgoutham@cavium.com> Cc: Chris Metcalf <cmetcalf@mellanox.com> Cc: Manish Chopra <manish.chopra@qlogic.com> Cc: Yuval Mintz <yuval.mintz@qlogic.com> Cc: Tariq Toukan <tariqt@mellanox.com> Cc: Saeed Mahameed <saeedm@mellanox.com> Signed-off-by:
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Joonsoo Kim authored
page_reference manipulation functions are introduced to track down reference count change of the page. Use it instead of direct modification of _count. Signed-off-by:
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Li Peng authored
/sys/kernel/slab/xx/defrag_ratio should be remote_node_defrag_ratio. Link: http://lkml.kernel.org/r/1463449242-5366-1-git-send-email-lip@dtdream.comSigned-off-by:
Li Peng <lip@dtdream.com> Acked-by:
Christoph Lameter <cl@linux.com> Signed-off-by:
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Yang Shi authored
Now we have IS_ENABLED helper to check if a Kconfig option is enabled or not, so ZONE_DMA_FLAG sounds no longer useful. And, the use of ZONE_DMA_FLAG in slab looks pointless according to the comment [1] from Johannes Weiner, so remove them and ORing passed in flags with the cache gfp flags has been done in kmem_getpages(). [1] https://lkml.org/lkml/2014/9/25/553 Link: http://lkml.kernel.org/r/1462381297-11009-1-git-send-email-yang.shi@linaro.orgSigned-off-by:
Yang Shi <yang.shi@linaro.org> 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> Cc: Johannes Weiner <hannes@cmpxchg.org> Signed-off-by:
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Thomas Garnier authored
Provides an optional config (CONFIG_SLAB_FREELIST_RANDOM) to randomize the SLAB freelist. The list is randomized during initialization of a new set of pages. The order on different freelist sizes is pre-computed at boot for performance. Each kmem_cache has its own randomized freelist. Before pre-computed lists are available freelists are generated dynamically. This security feature reduces the predictability of the kernel SLAB allocator against heap overflows rendering attacks much less stable. For example this attack against SLUB (also applicable against SLAB) would be affected: https://jon.oberheide.org/blog/2010/09/10/linux-kernel-can-slub-overflow/ Also, since v4.6 the freelist was moved at the end of the SLAB. It means a controllable heap is opened to new attacks not yet publicly discussed. A kernel heap overflow can be transformed to multiple use-after-free. This feature makes this type of attack harder too. To generate entropy, we use get_random_bytes_arch because 0 bits of entropy is available in the boot stage. In the worse case this function will fallback to the get_random_bytes sub API. We also generate a shift random number to shift pre-computed freelist for each new set of pages. The config option name is not specific to the SLAB as this approach will be extended to other allocators like SLUB. Performance results highlighted no major changes: Hackbench (running 90 10 times): Before average: 0.0698 After average: 0.0663 (-5.01%) slab_test 1 run on boot. Difference only seen on the 2048 size test being the worse case scenario covered by freelist randomization. New slab pages are constantly being created on the 10000 allocations. Variance should be mainly due to getting new pages every few allocations. Before: Single thread testing ===================== 1. Kmalloc: Repeatedly allocate then free test 10000 times kmalloc(8) -> 99 cycles kfree -> 112 cycles 10000 times kmalloc(16) -> 109 cycles kfree -> 140 cycles 10000 times kmalloc(32) -> 129 cycles kfree -> 137 cycles 10000 times kmalloc(64) -> 141 cycles kfree -> 141 cycles 10000 times kmalloc(128) -> 152 cycles kfree -> 148 cycles 10000 times kmalloc(256) -> 195 cycles kfree -> 167 cycles 10000 times kmalloc(512) -> 257 cycles kfree -> 199 cycles 10000 times kmalloc(1024) -> 393 cycles kfree -> 251 cycles 10000 times kmalloc(2048) -> 649 cycles kfree -> 228 cycles 10000 times kmalloc(4096) -> 806 cycles kfree -> 370 cycles 10000 times kmalloc(8192) -> 814 cycles kfree -> 411 cycles 10000 times kmalloc(16384) -> 892 cycles kfree -> 455 cycles 2. Kmalloc: alloc/free test 10000 times kmalloc(8)/kfree -> 121 cycles 10000 times kmalloc(16)/kfree -> 121 cycles 10000 times kmalloc(32)/kfree -> 121 cycles 10000 times kmalloc(64)/kfree -> 121 cycles 10000 times kmalloc(128)/kfree -> 121 cycles 10000 times kmalloc(256)/kfree -> 119 cycles 10000 times kmalloc(512)/kfree -> 119 cycles 10000 times kmalloc(1024)/kfree -> 119 cycles 10000 times kmalloc(2048)/kfree -> 119 cycles 10000 times kmalloc(4096)/kfree -> 121 cycles 10000 times kmalloc(8192)/kfree -> 119 cycles 10000 times kmalloc(16384)/kfree -> 119 cycles After: Single thread testing ===================== 1. Kmalloc: Repeatedly allocate then free test 10000 times kmalloc(8) -> 130 cycles kfree -> 86 cycles 10000 times kmalloc(16) -> 118 cycles kfree -> 86 cycles 10000 times kmalloc(32) -> 121 cycles kfree -> 85 cycles 10000 times kmalloc(64) -> 176 cycles kfree -> 102 cycles 10000 times kmalloc(128) -> 178 cycles kfree -> 100 cycles 10000 times kmalloc(256) -> 205 cycles kfree -> 109 cycles 10000 times kmalloc(512) -> 262 cycles kfree -> 136 cycles 10000 times kmalloc(1024) -> 342 cycles kfree -> 157 cycles 10000 times kmalloc(2048) -> 701 cycles kfree -> 238 cycles 10000 times kmalloc(4096) -> 803 cycles kfree -> 364 cycles 10000 times kmalloc(8192) -> 835 cycles kfree -> 404 cycles 10000 times kmalloc(16384) -> 896 cycles kfree -> 441 cycles 2. Kmalloc: alloc/free test 10000 times kmalloc(8)/kfree -> 121 cycles 10000 times kmalloc(16)/kfree -> 121 cycles 10000 times kmalloc(32)/kfree -> 123 cycles 10000 times kmalloc(64)/kfree -> 142 cycles 10000 times kmalloc(128)/kfree -> 121 cycles 10000 times kmalloc(256)/kfree -> 119 cycles 10000 times kmalloc(512)/kfree -> 119 cycles 10000 times kmalloc(1024)/kfree -> 119 cycles 10000 times kmalloc(2048)/kfree -> 119 cycles 10000 times kmalloc(4096)/kfree -> 119 cycles 10000 times kmalloc(8192)/kfree -> 119 cycles 10000 times kmalloc(16384)/kfree -> 119 cycles [akpm@linux-foundation.org: propagate gfp_t into cache_random_seq_create()] Signed-off-by:
Thomas Garnier <thgarnie@google.com> Acked-by:
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Vladimir Davydov authored
When we call __kmem_cache_shrink on memory cgroup removal, we need to synchronize kmem_cache->cpu_partial update with put_cpu_partial that might be running on other cpus. Currently, we achieve that by using kick_all_cpus_sync, which works as a system wide memory barrier. Though fast it is, this method has a flaw - it issues a lot of IPIs, which might hurt high performance or real-time workloads. To fix this, let's replace kick_all_cpus_sync with synchronize_sched. Although the latter one may take much longer to finish, it shouldn't be a problem in this particular case, because memory cgroups are destroyed asynchronously from a workqueue so that no user visible effects should be introduced. OTOH, it will save us from excessive IPIs when someone removes a cgroup. Anyway, even if using synchronize_sched turns out to take too long, we can always introduce a kind of __kmem_cache_shrink batching so that this method would only be called once per one cgroup destruction (not per each per memcg kmem cache as it is now). Signed-off-by:
Vladimir Davydov <vdavydov@virtuozzo.com> Reported-by:
Peter Zijlstra <peterz@infradead.org> Suggested-by:
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Joonsoo Kim authored
To check whether free objects exist or not precisely, we need to grab a lock. But, accuracy isn't that important because race window would be even small and if there is too much free object, cache reaper would reap it. So, this patch makes the check for free object exisistence not to hold a lock. This will reduce lock contention in heavily allocation case. Note that until now, n->shared can be freed during the processing by writing slabinfo, but, with some trick in this patch, we can access it freely within interrupt disabled period. Below is the result of concurrent allocation/free in slab allocation benchmark made by Christoph a long time ago. I make the output simpler. The number shows cycle count during alloc/free respectively so less is better. * Before Kmalloc N*alloc N*free(32): Average=248/966 Kmalloc N*alloc N*free(64): Average=261/949 Kmalloc N*alloc N*free(128): Average=314/1016 Kmalloc N*alloc N*free(256): Average=741/1061 Kmalloc N*alloc N*free(512): Average=1246/1152 Kmalloc N*alloc N*free(1024): Average=2437/1259 Kmalloc N*alloc N*free(2048): Average=4980/1800 Kmalloc N*alloc N*free(4096): Average=9000/2078 * After Kmalloc N*alloc N*free(32): Average=344/792 Kmalloc N*alloc N*free(64): Average=347/882 Kmalloc N*alloc N*free(128): Average=390/959 Kmalloc N*alloc N*free(256): Average=393/1067 Kmalloc N*alloc N*free(512): Average=683/1229 Kmalloc N*alloc N*free(1024): Average=1295/1325 Kmalloc N*alloc N*free(2048): Average=2513/1664 Kmalloc N*alloc N*free(4096): Average=4742/2172 It shows that allocation performance decreases for the object size up to 128 and it may be due to extra checks in cache_alloc_refill(). But, with considering improvement of free performance, net result looks the same. Result for other size class looks very promising, roughly, 50% performance improvement. Signed-off-by:
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Joonsoo Kim authored
Until now, cache growing makes a free slab on node's slab list and then we can allocate free objects from it. This necessarily requires to hold a node lock which is very contended. If we refill cpu cache before attaching it to node's slab list, we can avoid holding a node lock as much as possible because this newly allocated slab is only visible to the current task. This will reduce lock contention. Below is the result of concurrent allocation/free in slab allocation benchmark made by Christoph a long time ago. I make the output simpler. The number shows cycle count during alloc/free respectively so less is better. * Before Kmalloc N*alloc N*free(32): Average=355/750 Kmalloc N*alloc N*free(64): Average=452/812 Kmalloc N*alloc N*free(128): Average=559/1070 Kmalloc N*alloc N*free(256): Average=1176/980 Kmalloc N*alloc N*free(512): Average=1939/1189 Kmalloc N*alloc N*free(1024): Average=3521/1278 Kmalloc N*alloc N*free(2048): Average=7152/1838 Kmalloc N*alloc N*free(4096): Average=13438/2013 * After Kmalloc N*alloc N*free(32): Average=248/966 Kmalloc N*alloc N*free(64): Average=261/949 Kmalloc N*alloc N*free(128): Average=314/1016 Kmalloc N*alloc N*free(256): Average=741/1061 Kmalloc N*alloc N*free(512): Average=1246/1152 Kmalloc N*alloc N*free(1024): Average=2437/1259 Kmalloc N*alloc N*free(2048): Average=4980/1800 Kmalloc N*alloc N*free(4096): Average=9000/2078 It shows that contention is reduced for all the object sizes and performance increases by 30 ~ 40%. Signed-off-by:
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Joonsoo Kim authored
This is a preparation step to implement lockless allocation path when there is no free objects in kmem_cache. What we'd like to do here is to refill cpu cache without holding a node lock. To accomplish this purpose, refill should be done after new slab allocation but before attaching the slab to the management list. So, this patch separates cache_grow() to two parts, allocation and attaching to the list in order to add some code inbetween them in the following patch. Signed-off-by:
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Joonsoo Kim authored
Currently, cache_grow() assumes that allocated page's nodeid would be same with parameter nodeid which is used for allocation request. If we discard this assumption, we can handle fallback_alloc() case gracefully. So, this patch makes cache_grow() handle the page allocated on arbitrary node and clean-up relevant code. Signed-off-by:
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Joonsoo Kim authored
Slab color isn't needed to be changed strictly. Because locking for changing slab color could cause more lock contention so this patch implements racy access/modify the slab color. This is a preparation step to implement lockless allocation path when there is no free objects in the kmem_cache. Below is the result of concurrent allocation/free in slab allocation benchmark made by Christoph a long time ago. I make the output simpler. The number shows cycle count during alloc/free respectively so less is better. * Before Kmalloc N*alloc N*free(32): Average=365/806 Kmalloc N*alloc N*free(64): Average=452/690 Kmalloc N*alloc N*free(128): Average=736/886 Kmalloc N*alloc N*free(256): Average=1167/985 Kmalloc N*alloc N*free(512): Average=2088/1125 Kmalloc N*alloc N*free(1024): Average=4115/1184 Kmalloc N*alloc N*free(2048): Average=8451/1748 Kmalloc N*alloc N*free(4096): Average=16024/2048 * After Kmalloc N*alloc N*free(32): Average=355/750 Kmalloc N*alloc N*free(64): Average=452/812 Kmalloc N*alloc N*free(128): Average=559/1070 Kmalloc N*alloc N*free(256): Average=1176/980 Kmalloc N*alloc N*free(512): Average=1939/1189 Kmalloc N*alloc N*free(1024): Average=3521/1278 Kmalloc N*alloc N*free(2048): Average=7152/1838 Kmalloc N*alloc N*free(4096): Average=13438/2013 It shows that contention is reduced for object size >= 1024 and performance increases by roughly 15%. Signed-off-by:
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Joonsoo Kim authored
Currently, determination to free a slab is done whenever each freed object is put into the slab. This has a following problem. Assume free_limit = 10 and nr_free = 9. Free happens as following sequence and nr_free changes as following. free(become a free slab) free(not become a free slab) nr_free: 9 -> 10 (at first free) -> 11 (at second free) If we try to check if we can free current slab or not on each object free, we can't free any slab in this situation because current slab isn't a free slab when nr_free exceed free_limit (at second free) even if there is a free slab. However, if we check it lastly, we can free 1 free slab. This problem would cause to keep too much memory in the slab subsystem. This patch try to fix it by checking number of free object after all free work is done. If there is free slab at that time, we can free slab as much as possible so we keep free slab as minimal. Signed-off-by:
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Joonsoo Kim authored
There are mostly same code for setting up kmem_cache_node either in cpuup_prepare() or alloc_kmem_cache_node(). Factor out and clean-up them. Signed-off-by:
Nishanth Menon <nm@ti.com> Tested-by:
Jon Hunter <jonathanh@nvidia.com> Acked-by:
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Joonsoo Kim authored
It can be reused on other place, so factor out it. Following patch will use it. Signed-off-by:
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Joonsoo Kim authored
slabs_tofree() implies freeing all free slab. We can do it with just providing INT_MAX. Signed-off-by:
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Joonsoo Kim authored
Initial attemp to remove BAD_ALIEN_MAGIC is once reverted by 'commit edcad250 ("Revert "slab: remove BAD_ALIEN_MAGIC"")' because it causes a problem on m68k which has many node but !CONFIG_NUMA. In this case, although alien cache isn't used at all but to cope with some initialization path, garbage value is used and that is BAD_ALIEN_MAGIC. Now, this patch set use_alien_caches to 0 when !CONFIG_NUMA, there is no initialization path problem so we don't need BAD_ALIEN_MAGIC at all. So remove it. Signed-off-by:
Geert Uytterhoeven <geert@linux-m68k.org> Acked-by:
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Joonsoo Kim authored
While processing concurrent allocation, SLAB could be contended a lot because it did a lots of work with holding a lock. This patchset try to reduce the number of critical section to reduce lock contention. Major changes are lockless decision to allocate more slab and lockless cpu cache refill from the newly allocated slab. Below is the result of concurrent allocation/free in slab allocation benchmark made by Christoph a long time ago. I make the output simpler. The number shows cycle count during alloc/free respectively so less is better. * Before Kmalloc N*alloc N*free(32): Average=365/806 Kmalloc N*alloc N*free(64): Average=452/690 Kmalloc N*alloc N*free(128): Average=736/886 Kmalloc N*alloc N*free(256): Average=1167/985 Kmalloc N*alloc N*free(512): Average=2088/1125 Kmalloc N*alloc N*free(1024): Average=4115/1184 Kmalloc N*alloc N*free(2048): Average=8451/1748 Kmalloc N*alloc N*free(4096): Average=16024/2048 * After Kmalloc N*alloc N*free(32): Average=344/792 Kmalloc N*alloc N*free(64): Average=347/882 Kmalloc N*alloc N*free(128): Average=390/959 Kmalloc N*alloc N*free(256): Average=393/1067 Kmalloc N*alloc N*free(512): Average=683/1229 Kmalloc N*alloc N*free(1024): Average=1295/1325 Kmalloc N*alloc N*free(2048): Average=2513/1664 Kmalloc N*alloc N*free(4096): Average=4742/2172 It shows that performance improves greatly (roughly more than 50%) for the object class whose size is more than 128 bytes. This patch (of 11): If we don't hold neither the slab_mutex nor the node lock, node's shared array cache could be freed and re-populated. If __kmem_cache_shrink() is called at the same time, it will call drain_array() with n->shared without holding node lock so problem can happen. This patch fix the situation by holding the node lock before trying to drain the shared array. In addition, add a debug check to confirm that n->shared access race doesn't exist. Signed-off-by:
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Arnd Bergmann authored
A recent cleanup removed some exported functions that were not used anywhere, which in turn exposed the fact that some other functions in the same file are only used in some configurations. We now get a warning about them when CONFIG_HOTPLUG_CPU is disabled: kernel/padata.c:670:12: error: '__padata_remove_cpu' defined but not used [-Werror=unused-function] static int __padata_remove_cpu(struct padata_instance *pinst, int cpu) ^~~~~~~~~~~~~~~~~~~ kernel/padata.c:650:12: error: '__padata_add_cpu' defined but not used [-Werror=unused-function] static int __padata_add_cpu(struct padata_instance *pinst, int cpu) This rearranges the code so the __padata_remove_cpu/__padata_add_cpu functions are within the #ifdef that protects the code that calls them. [akpm@linux-foundation.org: coding-style fixes] Fixes: 4ba6d78c671e ("kernel/padata.c: removed unused code") Signed-off-by:Arnd Bergmann <arnd@arndb.de> Cc: Richard Cochran <rcochran@linutronix.de> Cc: Steffen Klassert <steffen.klassert@secunet.com> Signed-off-by:
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Richard Cochran authored
By accident I stumbled across code that has never been used. This driver has EXPORT_SYMBOL functions, and the only user of the code is pcrypt.c, but this only uses a subset of the exported symbols. According to 'git log -G', the functions, padata_set_cpumasks, padata_add_cpu, and padata_remove_cpu have never been used since they were first introduced. This patch removes the unused code. On one 64 bit build, with CRYPTO_PCRYPT built in, the text is more than 4k smaller. kbuild_hp> size $KBUILD_OUTPUT/vmlinux text data bss dec hex filename 10566658 4678360 1122304 16367322 f9beda vmlinux 10561984 4678360 1122304 16362648 f9ac98 vmlinux On another config, 32 bit, the saving is about 0.5k bytes. kbuild_hp-x86> size $KBUILD_OUTPUT/vmlinux 6012005 2409513 2785280 11206798 ab008e vmlinux 6011491 2409513 2785280 11206284 aafe8c vmlinux Signed-off-by:Richard Cochran <rcochran@linutronix.de> Cc: Steffen Klassert <steffen.klassert@secunet.com> Cc: Herbert Xu <herbert@gondor.apana.org.au> Cc: "David S. Miller" <davem@davemloft.net> Signed-off-by:
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Guozhonghua authored
The goto is not useful in ocfs2_put_slot(), so delete it. Signed-off-by:
Guozhonghua <guozhonghua@h3c.com> Cc: Mark Fasheh <mfasheh@suse.de> Cc: Joel Becker <jlbec@evilplan.org> Cc: Junxiao Bi <junxiao.bi@oracle.com> Cc: Joseph Qi <joseph.qi@huawei.com> Signed-off-by:
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Jun Piao authored
Clean up unused parameter 'count' in o2hb_read_block_input(). Signed-off-by:
Jun Piao <piaojun@huawei.com> Reviewed-by:
Joseph Qi <joseph.qi@huawei.com> Cc: Mark Fasheh <mfasheh@suse.de> Cc: Joel Becker <jlbec@evilplan.org> Cc: Junxiao Bi <junxiao.bi@oracle.com> Signed-off-by:
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piaojun authored
Clean up an unused variable 'wants_rotate' in ocfs2_truncate_rec. Signed-off-by:
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Guozhonghua authored
The comment in ocfs2_extended_slot has the offset wrong. Cc: Mark Fasheh <mfasheh@suse.de> Cc: Joel Becker <jlbec@evilplan.org> Cc: Junxiao Bi <junxiao.bi@oracle.com> Cc: Joseph Qi <joseph.qi@huawei.com> Signed-off-by:
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Du, Changbin authored
When activating a static object we need make sure that the object is tracked in the object tracker. If it is a non-static object then the activation is illegal. In previous implementation, each subsystem need take care of this in their fixup callbacks. Actually we can put it into debugobjects core. Thus we can save duplicated code, and have *pure* fixup callbacks. To achieve this, a new callback "is_static_object" is introduced to let the type specific code decide whether a object is static or not. If yes, we take it into object tracker, otherwise give warning and invoke fixup callback. This change has paassed debugobjects selftest, and I also do some test with all debugobjects supports enabled. At last, I have a concern about the fixups that can it change the object which is in incorrect state on fixup? Because the 'addr' may not point to any valid object if a non-static object is not tracked. Then Change such object can overwrite someone's memory and cause unexpected behaviour. For example, the timer_fixup_activate bind timer to function stub_timer. Link: http://lkml.kernel.org/r/1462576157-14539-1-git-send-email-changbin.du@intel.com [changbin.du@intel.com: improve code comments where invoke the new is_static_object callback] Link: http://lkml.kernel.org/r/1462777431-8171-1-git-send-email-changbin.du@intel.comSigned-off-by:
Du, Changbin <changbin.du@intel.com> Cc: Jonathan Corbet <corbet@lwn.net> Cc: Josh Triplett <josh@kernel.org> Cc: Steven Rostedt <rostedt@goodmis.org> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: Tejun Heo <tj@kernel.org> Cc: Christian Borntraeger <borntraeger@de.ibm.com> Signed-off-by:
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Du, Changbin authored
Update documentation creangponding to change(debugobjects: make fixup functions return bool instead of int). Signed-off-by:
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Du, Changbin authored
Update the return type to use bool instead of int, corresponding to cheange (debugobjects: make fixup functions return bool instead of int). Signed-off-by:
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Du, Changbin authored
Update the return type to use bool instead of int, corresponding to cheange (debugobjects: make fixup functions return bool instead of int). Signed-off-by:
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Du, Changbin authored
Update the return type to use bool instead of int, corresponding to cheange (debugobjects: make fixup functions return bool instead of int). Signed-off-by:
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Du, Changbin authored
Update the return type to use bool instead of int, corresponding to change (debugobjects: make fixup functions return bool instead of int) Signed-off-by:
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Du, Changbin authored
If debug_object_fixup() return non-zero when problem has been fixed. But the code got it backwards, it taks 0 as fixup successfully. So fix it. Signed-off-by:
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Du, Changbin authored
I am going to introduce debugobjects infrastructure to USB subsystem. But before this, I found the code of debugobjects could be improved. This patchset will make fixup functions return bool type instead of int. Because fixup only need report success or no. boolean is the 'real' type. This patch (of 7): The object debugging infrastructure core provides some fixup callbacks for the subsystem who use it. These callbacks are called from the debug code whenever a problem in debug_object_init is detected. And debugobjects core suppose them returns 1 when the fixup was successful, otherwise 0. So the return type is boolean. A bad thing is that debug_object_fixup use the return value for arithmetic operation. It confused me that what is the reall return type. Reading over the whole code, I found some place do use the return value incorrectly(see next patch). So why use bool type instead? Signed-off-by:
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Vineet Gupta authored
This adds an additional line of output (to reduce the chances of breaking any existing output parsers) which prints the total size before and after and the relative difference. add/remove: 39/0 grow/shrink: 12408/55 up/down: 362227/-1430 (360797) function old new delta ext4_fill_super 10556 12590 +2034 _fpadd_parts - 1186 +1186 ntfs_fill_super 5340 6164 +824 ... ... __divdf3 752 386 -366 unlzma 3682 3274 -408 Total: Before=5023101, After=5383898, chg 7.000000% ^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^ Link: http://lkml.kernel.org/r/1463124110-30314-1-git-send-email-vgupta@synopsys.comSigned-off-by:
Vineet Gupta <vgupta@synopsys.com> Cc: Josh Triplett <josh@joshtriplett.org> Cc: Michal Marek <mmarek@suse.cz> Signed-off-by:
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Kees Cook authored
A few instances of "fimware" instead of "firmware" were found. Fix these and add it to the spelling.txt file. Signed-off-by:
Kees Cook <keescook@chromium.org> Reported-by:
Randy Dunlap <rdunlap@infradead.org> Signed-off-by:
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