Skip to content

K
Kernel

openeuler / Kernel
接近 2 年 前同步成功

通知 8
Star 0
Fork 0
K
Kernel
切换分支/标签
  1. 25 5月, 2019 3 次提交
    • J
      bpf: verifier: insert zero extension according to analysis result · a4b1d3c1
      由 Jiong Wang 提交于 
      After previous patches, verifier will mark a insn if it really needs zero
extension on dst_reg.

It is then for back-ends to decide how to use such information to eliminate
unnecessary zero extension code-gen during JIT compilation.

One approach is verifier insert explicit zero extension for those insns
that need zero extension in a generic way, JIT back-ends then do not
generate zero extension for sub-register write at default.

However, only those back-ends which do not have hardware zero extension
want this optimization. Back-ends like x86_64 and AArch64 have hardware
zero extension support that the insertion should be disabled.

This patch introduces new target hook "bpf_jit_needs_zext" which returns
false at default, meaning verifier zero extension insertion is disabled at
default. A back-end could override this hook to return true if it doesn't
have hardware support and want verifier insert zero extension explicitly.

Offload targets do not use this native target hook, instead, they could
get the optimization results using bpf_prog_offload_ops.finalize.

NOTE: arches could have diversified features, it is possible for one arch
to have hardware zero extension support for some sub-register write insns
but not for all. For example, PowerPC, SPARC have zero extended loads, but
not for alu32. So when verifier zero extension insertion enabled, these JIT
back-ends need to peephole insns to remove those zero extension inserted
for insn that actually has hardware zero extension support. The peephole
could be as simple as looking the next insn, if it is a special zero
extension insn then it is safe to eliminate it if the current insn has
hardware zero extension support.
Reviewed-by: NJakub Kicinski <jakub.kicinski@netronome.com>
Signed-off-by: NJiong Wang <jiong.wang@netronome.com>
Signed-off-by: NAlexei Starovoitov <ast@kernel.org>
      a4b1d3c1
    • J
      bpf: introduce new mov32 variant for doing explicit zero extension · 7d134041
      由 Jiong Wang 提交于 
      The encoding for this new variant is based on BPF_X format. "imm" field was
0 only, now it could be 1 which means doing zero extension unconditionally

  .code = BPF_ALU | BPF_MOV | BPF_X
  .dst_reg = DST
  .src_reg = SRC
  .imm  = 1

We use this new form for doing zero extension for which verifier will
guarantee SRC == DST.

Implications on JIT back-ends when doing code-gen for
BPF_ALU | BPF_MOV | BPF_X:
  1. No change if hardware already does zero extension unconditionally for
     sub-register write.
  2. Otherwise, when seeing imm == 1, just generate insns to clear high
     32-bit. No need to generate insns for the move because when imm == 1,
     dst_reg is the same as src_reg at the moment.

Interpreter doesn't need change as well. It is doing unconditionally zero
extension for mov32 already.

One helper macro BPF_ZEXT_REG is added to help creating zero extension
insn using this new mov32 variant.

One helper function insn_is_zext is added for checking one insn is an
zero extension on dst. This will be widely used by a few JIT back-ends in
later patches in this set.
Signed-off-by: NJiong Wang <jiong.wang@netronome.com>
Signed-off-by: NAlexei Starovoitov <ast@kernel.org>
      7d134041
    • J
      bpf: verifier: mark verified-insn with sub-register zext flag · 5327ed3d
      由 Jiong Wang 提交于 
      eBPF ISA specification requires high 32-bit cleared when low 32-bit
sub-register is written. This applies to destination register of ALU32 etc.
JIT back-ends must guarantee this semantic when doing code-gen. x86_64 and
AArch64 ISA has the same semantics, so the corresponding JIT back-end
doesn't need to do extra work.

However, 32-bit arches (arm, x86, nfp etc.) and some other 64-bit arches
(PowerPC, SPARC etc) need to do explicit zero extension to meet this
requirement, otherwise code like the following will fail.

  u64_value = (u64) u32_value
  ... other uses of u64_value

This is because compiler could exploit the semantic described above and
save those zero extensions for extending u32_value to u64_value, these JIT
back-ends are expected to guarantee this through inserting extra zero
extensions which however could be a significant increase on the code size.
Some benchmarks show there could be ~40% sub-register writes out of total
insns, meaning at least ~40% extra code-gen.

One observation is these extra zero extensions are not always necessary.
Take above code snippet for example, it is possible u32_value will never be
casted into a u64, the value of high 32-bit of u32_value then could be
ignored and extra zero extension could be eliminated.

This patch implements this idea, insns defining sub-registers will be
marked when the high 32-bit of the defined sub-register matters. For
those unmarked insns, it is safe to eliminate high 32-bit clearnace for
them.

Algo:
 - Split read flags into READ32 and READ64.

 - Record index of insn that does sub-register write. Keep the index inside
   reg state and update it during verifier insn walking.

 - A full register read on a sub-register marks its definition insn as
   needing zero extension on dst register.

   A new sub-register write overrides the old one.

 - When propagating read64 during path pruning, also mark any insn defining
   a sub-register that is read in the pruned path as full-register.
Reviewed-by: NJakub Kicinski <jakub.kicinski@netronome.com>
Signed-off-by: NJiong Wang <jiong.wang@netronome.com>
Signed-off-by: NAlexei Starovoitov <ast@kernel.org>
      5327ed3d
  3. 24 5月, 2019 2 次提交
    • A
      bpf: convert explored_states to hash table · dc2a4ebc
      由 Alexei Starovoitov 提交于 
      All prune points inside a callee bpf function most likely will have
different callsites. For example, if function foo() is called from
two callsites the half of explored states in all prune points in foo()
will be useless for subsequent walking of one of those callsites.
Fortunately explored_states pruning heuristics keeps the number of states
per prune point small, but walking these states is still a waste of cpu
time when the callsite of the current state is different from the callsite
of the explored state.

To improve pruning logic convert explored_states into hash table and
use simple insn_idx ^ callsite hash to select hash bucket.
This optimization has no effect on programs without bpf2bpf calls
and drastically improves programs with calls.
In the later case it reduces total memory consumption in 1M scale tests
by almost 3 times (peak_states drops from 5752 to 2016).

Care should be taken when comparing the states for equivalency.
Since the same hash bucket can now contain states with different indices
the insn_idx has to be part of verifier_state and compared.

Different hash table sizes and different hash functions were explored,
but the results were not significantly better vs this patch.
They can be improved in the future.

Hit/miss heuristic is not counting index miscompare as a miss.
Otherwise verifier stats become unstable when experimenting
with different hash functions.
Signed-off-by: NAlexei Starovoitov <ast@kernel.org>
Signed-off-by: NDaniel Borkmann <daniel@iogearbox.net>
      dc2a4ebc
    • A
      bpf: split explored_states · a8f500af
      由 Alexei Starovoitov 提交于 
      split explored_states into prune_point boolean mark
and link list of explored states.
This removes STATE_LIST_MARK hack and allows marks to be separate from states.
Signed-off-by: NAlexei Starovoitov <ast@kernel.org>
Signed-off-by: NDaniel Borkmann <daniel@iogearbox.net>
      a8f500af
  5. 23 5月, 2019 1 次提交
  7. 21 5月, 2019 8 次提交
  9. 20 5月, 2019 1 次提交
  11. 19 5月, 2019 2 次提交
    • F
      panic: add an option to replay all the printk message in buffer · de6da1e8
      由 Feng Tang 提交于 
      Currently on panic, kernel will lower the loglevel and print out pending
printk msg only with console_flush_on_panic().

Add an option for users to configure the "panic_print" to replay all
dmesg in buffer, some of which they may have never seen due to the
loglevel setting, which will help panic debugging .

[feng.tang@intel.com: keep the original console_flush_on_panic() inside panic()]
  Link: http://lkml.kernel.org/r/1556199137-14163-1-git-send-email-feng.tang@intel.com
[feng.tang@intel.com: use logbuf lock to protect the console log index]
  Link: http://lkml.kernel.org/r/1556269868-22654-1-git-send-email-feng.tang@intel.com
Link: http://lkml.kernel.org/r/1556095872-36838-1-git-send-email-feng.tang@intel.comSigned-off-by: NFeng Tang <feng.tang@intel.com>
Reviewed-by: NPetr Mladek <pmladek@suse.com>
Cc: Aaro Koskinen <aaro.koskinen@nokia.com>
Cc: Petr Mladek <pmladek@suse.com>
Cc: Steven Rostedt <rostedt@goodmis.org>
Cc: Sergey Senozhatsky <sergey.senozhatsky.work@gmail.com>
Cc: Kees Cook <keescook@chromium.org>
Cc: Borislav Petkov <bp@suse.de>
Signed-off-by: NAndrew Morton <akpm@linux-foundation.org>
Signed-off-by: NLinus Torvalds <torvalds@linux-foundation.org>
      de6da1e8
    • U
      mm/vmalloc.c: keep track of free blocks for vmap allocation · 68ad4a33
      由 Uladzislau Rezki (Sony) 提交于 
      Patch series "improve vmap allocation", v3.

Objective
---------

Please have a look for the description at:

  https://lkml.org/lkml/2018/10/19/786

but let me also summarize it a bit here as well.

The current implementation has O(N) complexity. Requests with different
permissive parameters can lead to long allocation time. When i say
"long" i mean milliseconds.

Description
-----------

This approach organizes the KVA memory layout into free areas of the
1-ULONG_MAX range, i.e.  an allocation is done over free areas lookups,
instead of finding a hole between two busy blocks.  It allows to have
lower number of objects which represent the free space, therefore to have
less fragmented memory allocator.  Because free blocks are always as large
as possible.

It uses the augment tree where all free areas are sorted in ascending
order of va->va_start address in pair with linked list that provides
O(1) access to prev/next elements.

Since the tree is augment, we also maintain the "subtree_max_size" of VA
that reflects a maximum available free block in its left or right
sub-tree.  Knowing that, we can easily traversal toward the lowest (left
most path) free area.

Allocation: ~O(log(N)) complexity.  It is sequential allocation method
therefore tends to maximize locality.  The search is done until a first
suitable block is large enough to encompass the requested parameters.
Bigger areas are split.

I copy paste here the description of how the area is split, since i
described it in https://lkml.org/lkml/2018/10/19/786

<snip>

A free block can be split by three different ways.  Their names are
FL_FIT_TYPE, LE_FIT_TYPE/RE_FIT_TYPE and NE_FIT_TYPE, i.e.  they
correspond to how requested size and alignment fit to a free block.

FL_FIT_TYPE - in this case a free block is just removed from the free
list/tree because it fully fits.  Comparing with current design there is
an extra work with rb-tree updating.

LE_FIT_TYPE/RE_FIT_TYPE - left/right edges fit.  In this case what we do
is just cutting a free block.  It is as fast as a current design.  Most of
the vmalloc allocations just end up with this case, because the edge is
always aligned to 1.

NE_FIT_TYPE - Is much less common case.  Basically it happens when
requested size and alignment does not fit left nor right edges, i.e.  it
is between them.  In this case during splitting we have to build a
remaining left free area and place it back to the free list/tree.

Comparing with current design there are two extra steps.  First one is we
have to allocate a new vmap_area structure.  Second one we have to insert
that remaining free block to the address sorted list/tree.

In order to optimize a first case there is a cache with free_vmap objects.
Instead of allocating from slab we just take an object from the cache and
reuse it.

Second one is pretty optimized.  Since we know a start point in the tree
we do not do a search from the top.  Instead a traversal begins from a
rb-tree node we split.
<snip>

De-allocation.  ~O(log(N)) complexity.  An area is not inserted straight
away to the tree/list, instead we identify the spot first, checking if it
can be merged around neighbors.  The list provides O(1) access to
prev/next, so it is pretty fast to check it.  Summarizing.  If merged then
large coalesced areas are created, if not the area is just linked making
more fragments.

There is one more thing that i should mention here.  After modification of
VA node, its subtree_max_size is updated if it was/is the biggest area in
its left or right sub-tree.  Apart of that it can also be populated back
to upper levels to fix the tree.  For more details please have a look at
the __augment_tree_propagate_from() function and the description.

Tests and stressing
-------------------

I use the "test_vmalloc.sh" test driver available under
"tools/testing/selftests/vm/" since 5.1-rc1 kernel.  Just trigger "sudo
./test_vmalloc.sh" to find out how to deal with it.

Tested on different platforms including x86_64/i686/ARM64/x86_64_NUMA.
Regarding last one, i do not have any physical access to NUMA system,
therefore i emulated it.  The time of stressing is days.

If you run the test driver in "stress mode", you also need the patch that
is in Andrew's tree but not in Linux 5.1-rc1.  So, please apply it:

http://git.cmpxchg.org/cgit.cgi/linux-mmotm.git/commit/?id=e0cf7749bade6da318e98e934a24d8b62fab512c

After massive testing, i have not identified any problems like memory
leaks, crashes or kernel panics.  I find it stable, but more testing would
be good.

Performance analysis
--------------------

I have used two systems to test.  One is i5-3320M CPU @ 2.60GHz and
another is HiKey960(arm64) board.  i5-3320M runs on 4.20 kernel, whereas
Hikey960 uses 4.15 kernel.  I have both system which could run on 5.1-rc1
as well, but the results have not been ready by time i an writing this.

Currently it consist of 8 tests.  There are three of them which correspond
to different types of splitting(to compare with default).  We have 3
ones(see above).  Another 5 do allocations in different conditions.

a) sudo ./test_vmalloc.sh performance

When the test driver is run in "performance" mode, it runs all available
tests pinned to first online CPU with sequential execution test order.  We
do it in order to get stable and repeatable results.  Take a look at time
difference in "long_busy_list_alloc_test".  It is not surprising because
the worst case is O(N).

# i5-3320M
How many cycles all tests took:
CPU0=646919905370(default) cycles vs CPU0=193290498550(patched) cycles

# See detailed table with results here:
ftp://vps418301.ovh.net/incoming/vmap_test_results_v2/i5-3320M_performance_default.txt
ftp://vps418301.ovh.net/incoming/vmap_test_results_v2/i5-3320M_performance_patched.txt

# Hikey960 8x CPUs
How many cycles all tests took:
CPU0=3478683207 cycles vs CPU0=463767978 cycles

# See detailed table with results here:
ftp://vps418301.ovh.net/incoming/vmap_test_results_v2/HiKey960_performance_default.txt
ftp://vps418301.ovh.net/incoming/vmap_test_results_v2/HiKey960_performance_patched.txt

b) time sudo ./test_vmalloc.sh test_repeat_count=1

With this configuration, all tests are run on all available online CPUs.
Before running each CPU shuffles its tests execution order.  It gives
random allocation behaviour.  So it is rough comparison, but it puts in
the picture for sure.

# i5-3320M
<default>            vs            <patched>
real    101m22.813s                real    0m56.805s
user    0m0.011s                   user    0m0.015s
sys     0m5.076s                   sys     0m0.023s

# See detailed table with results here:
ftp://vps418301.ovh.net/incoming/vmap_test_results_v2/i5-3320M_test_repeat_count_1_default.txt
ftp://vps418301.ovh.net/incoming/vmap_test_results_v2/i5-3320M_test_repeat_count_1_patched.txt

# Hikey960 8x CPUs
<default>            vs            <patched>
real    unknown                    real    4m25.214s
user    unknown                    user    0m0.011s
sys     unknown                    sys     0m0.670s

I did not manage to complete this test on "default Hikey960" kernel
version.  After 24 hours it was still running, therefore i had to cancel
it.  That is why real/user/sys are "unknown".

This patch (of 3):

Currently an allocation of the new vmap area is done over busy list
iteration(complexity O(n)) until a suitable hole is found between two busy
areas.  Therefore each new allocation causes the list being grown.  Due to
over fragmented list and different permissive parameters an allocation can
take a long time.  For example on embedded devices it is milliseconds.

This patch organizes the KVA memory layout into free areas of the
1-ULONG_MAX range.  It uses an augment red-black tree that keeps blocks
sorted by their offsets in pair with linked list keeping the free space in
order of increasing addresses.

Nodes are augmented with the size of the maximum available free block in
its left or right sub-tree.  Thus, that allows to take a decision and
traversal toward the block that will fit and will have the lowest start
address, i.e.  it is sequential allocation.

Allocation: to allocate a new block a search is done over the tree until a
suitable lowest(left most) block is large enough to encompass: the
requested size, alignment and vstart point.  If the block is bigger than
requested size - it is split.

De-allocation: when a busy vmap area is freed it can either be merged or
inserted to the tree.  Red-black tree allows efficiently find a spot
whereas a linked list provides a constant-time access to previous and next
blocks to check if merging can be done.  In case of merging of
de-allocated memory chunk a large coalesced area is created.

Complexity: ~O(log(N))

[urezki@gmail.com: v3]
  Link: http://lkml.kernel.org/r/20190402162531.10888-2-urezki@gmail.com
[urezki@gmail.com: v4]
  Link: http://lkml.kernel.org/r/20190406183508.25273-2-urezki@gmail.com
Link: http://lkml.kernel.org/r/20190321190327.11813-2-urezki@gmail.comSigned-off-by: NUladzislau Rezki (Sony) <urezki@gmail.com>
Reviewed-by: NRoman Gushchin <guro@fb.com>
Cc: Michal Hocko <mhocko@suse.com>
Cc: Matthew Wilcox <willy@infradead.org>
Cc: Thomas Garnier <thgarnie@google.com>
Cc: Oleksiy Avramchenko <oleksiy.avramchenko@sonymobile.com>
Cc: Steven Rostedt <rostedt@goodmis.org>
Cc: Joel Fernandes <joelaf@google.com>
Cc: Thomas Gleixner <tglx@linutronix.de>
Cc: Ingo Molnar <mingo@elte.hu>
Cc: Tejun Heo <tj@kernel.org>
Signed-off-by: NAndrew Morton <akpm@linux-foundation.org>
Signed-off-by: NLinus Torvalds <torvalds@linux-foundation.org>
      68ad4a33
  13. 18 5月, 2019 2 次提交
  15. 17 5月, 2019 3 次提交
    • Q
      slab: remove /proc/slab_allocators · 7878c231
      由 Qian Cai 提交于 
      It turned out that DEBUG_SLAB_LEAK is still broken even after recent
recue efforts that when there is a large number of objects like
kmemleak_object which is normal on a debug kernel,

  # grep kmemleak /proc/slabinfo
  kmemleak_object   2243606 3436210 ...

reading /proc/slab_allocators could easily loop forever while processing
the kmemleak_object cache and any additional freeing or allocating
objects will trigger a reprocessing. To make a situation worse,
soft-lockups could easily happen in this sitatuion which will call
printk() to allocate more kmemleak objects to guarantee an infinite
loop.

Also, since it seems no one had noticed when it was totally broken
more than 2-year ago - see the commit fcf88917 ("slab: fix a crash
by reading /proc/slab_allocators"), probably nobody cares about it
anymore due to the decline of the SLAB. Just remove it entirely.
Suggested-by: NVlastimil Babka <vbabka@suse.cz>
Suggested-by: NLinus Torvalds <torvalds@linux-foundation.org>
Signed-off-by: NQian Cai <cai@lca.pw>
Signed-off-by: NLinus Torvalds <torvalds@linux-foundation.org>
      7878c231
    • W
      net: test nouarg before dereferencing zerocopy pointers · 185ce5c3
      由 Willem de Bruijn 提交于 
      Zerocopy skbs without completion notification were added for packet
sockets with PACKET_TX_RING user buffers. Those signal completion
through the TP_STATUS_USER bit in the ring. Zerocopy annotation was
added only to avoid premature notification after clone or orphan, by
triggering a copy on these paths for these packets.

The mechanism had to define a special "no-uarg" mode because packet
sockets already use skb_uarg(skb) == skb_shinfo(skb)->destructor_arg
for a different pointer.

Before deferencing skb_uarg(skb), verify that it is a real pointer.

Fixes: 5cd8d46e ("packet: copy user buffers before orphan or clone")
Signed-off-by: NWillem de Bruijn <willemb@google.com>
Signed-off-by: NDavid S. Miller <davem@davemloft.net>
      185ce5c3
    • H
      rhashtable: Remove RCU marking from rhash_lock_head · ba6306e3
      由 Herbert Xu 提交于 
      The opaque type rhash_lock_head should not be marked with __rcu
because it can never be dereferenced.  We should apply the RCU
marking when we turn it into a pointer which can be dereferenced.

This patch does exactly that.  This fixes a number of sparse
warnings as well as getting rid of some unnecessary RCU checking.
Signed-off-by: NHerbert Xu <herbert@gondor.apana.org.au>
Signed-off-by: NDavid S. Miller <davem@davemloft.net>
      ba6306e3
  17. 16 5月, 2019 3 次提交
    • S
      clk: Remove io.h from clk-provider.h · 62e59c4e
      由 Stephen Boyd 提交于 
      Now that we've gotten rid of clk_readl() we can remove io.h from the
clk-provider header and push out the io.h include to any code that isn't
already including the io.h header but using things like readl/writel,
etc.

Found with this grep:

  git grep -l clk-provider.h | grep '.c$' | xargs git grep -L 'linux/io.h' | \
  	xargs git grep -l \
	-e '\<__iowrite32_copy\>' --or \
	-e '\<__ioread32_copy\>' --or \
	-e '\<__iowrite64_copy\>' --or \
	-e '\<ioremap_page_range\>' --or \
	-e '\<ioremap_huge_init\>' --or \
	-e '\<arch_ioremap_pud_supported\>' --or \
	-e '\<arch_ioremap_pmd_supported\>' --or \
	-e '\<devm_ioport_map\>' --or \
	-e '\<devm_ioport_unmap\>' --or \
	-e '\<IOMEM_ERR_PTR\>' --or \
	-e '\<devm_ioremap\>' --or \
	-e '\<devm_ioremap_nocache\>' --or \
	-e '\<devm_ioremap_wc\>' --or \
	-e '\<devm_iounmap\>' --or \
	-e '\<devm_ioremap_release\>' --or \
	-e '\<devm_memremap\>' --or \
	-e '\<devm_memunmap\>' --or \
	-e '\<__devm_memremap_pages\>' --or \
	-e '\<pci_remap_cfgspace\>' --or \
	-e '\<arch_has_dev_port\>' --or \
	-e '\<arch_phys_wc_add\>' --or \
	-e '\<arch_phys_wc_del\>' --or \
	-e '\<memremap\>' --or \
	-e '\<memunmap\>' --or \
	-e '\<arch_io_reserve_memtype_wc\>' --or \
	-e '\<arch_io_free_memtype_wc\>' --or \
	-e '\<__io_aw\>' --or \
	-e '\<__io_pbw\>' --or \
	-e '\<__io_paw\>' --or \
	-e '\<__io_pbr\>' --or \
	-e '\<__io_par\>' --or \
	-e '\<__raw_readb\>' --or \
	-e '\<__raw_readw\>' --or \
	-e '\<__raw_readl\>' --or \
	-e '\<__raw_readq\>' --or \
	-e '\<__raw_writeb\>' --or \
	-e '\<__raw_writew\>' --or \
	-e '\<__raw_writel\>' --or \
	-e '\<__raw_writeq\>' --or \
	-e '\<readb\>' --or \
	-e '\<readw\>' --or \
	-e '\<readl\>' --or \
	-e '\<readq\>' --or \
	-e '\<writeb\>' --or \
	-e '\<writew\>' --or \
	-e '\<writel\>' --or \
	-e '\<writeq\>' --or \
	-e '\<readb_relaxed\>' --or \
	-e '\<readw_relaxed\>' --or \
	-e '\<readl_relaxed\>' --or \
	-e '\<readq_relaxed\>' --or \
	-e '\<writeb_relaxed\>' --or \
	-e '\<writew_relaxed\>' --or \
	-e '\<writel_relaxed\>' --or \
	-e '\<writeq_relaxed\>' --or \
	-e '\<readsb\>' --or \
	-e '\<readsw\>' --or \
	-e '\<readsl\>' --or \
	-e '\<readsq\>' --or \
	-e '\<writesb\>' --or \
	-e '\<writesw\>' --or \
	-e '\<writesl\>' --or \
	-e '\<writesq\>' --or \
	-e '\<inb\>' --or \
	-e '\<inw\>' --or \
	-e '\<inl\>' --or \
	-e '\<outb\>' --or \
	-e '\<outw\>' --or \
	-e '\<outl\>' --or \
	-e '\<inb_p\>' --or \
	-e '\<inw_p\>' --or \
	-e '\<inl_p\>' --or \
	-e '\<outb_p\>' --or \
	-e '\<outw_p\>' --or \
	-e '\<outl_p\>' --or \
	-e '\<insb\>' --or \
	-e '\<insw\>' --or \
	-e '\<insl\>' --or \
	-e '\<outsb\>' --or \
	-e '\<outsw\>' --or \
	-e '\<outsl\>' --or \
	-e '\<insb_p\>' --or \
	-e '\<insw_p\>' --or \
	-e '\<insl_p\>' --or \
	-e '\<outsb_p\>' --or \
	-e '\<outsw_p\>' --or \
	-e '\<outsl_p\>' --or \
	-e '\<ioread8\>' --or \
	-e '\<ioread16\>' --or \
	-e '\<ioread32\>' --or \
	-e '\<ioread64\>' --or \
	-e '\<iowrite8\>' --or \
	-e '\<iowrite16\>' --or \
	-e '\<iowrite32\>' --or \
	-e '\<iowrite64\>' --or \
	-e '\<ioread16be\>' --or \
	-e '\<ioread32be\>' --or \
	-e '\<ioread64be\>' --or \
	-e '\<iowrite16be\>' --or \
	-e '\<iowrite32be\>' --or \
	-e '\<iowrite64be\>' --or \
	-e '\<ioread8_rep\>' --or \
	-e '\<ioread16_rep\>' --or \
	-e '\<ioread32_rep\>' --or \
	-e '\<ioread64_rep\>' --or \
	-e '\<iowrite8_rep\>' --or \
	-e '\<iowrite16_rep\>' --or \
	-e '\<iowrite32_rep\>' --or \
	-e '\<iowrite64_rep\>' --or \
	-e '\<__io_virt\>' --or \
	-e '\<pci_iounmap\>' --or \
	-e '\<virt_to_phys\>' --or \
	-e '\<phys_to_virt\>' --or \
	-e '\<ioremap_uc\>' --or \
	-e '\<ioremap\>' --or \
	-e '\<__ioremap\>' --or \
	-e '\<iounmap\>' --or \
	-e '\<ioremap\>' --or \
	-e '\<ioremap_nocache\>' --or \
	-e '\<ioremap_uc\>' --or \
	-e '\<ioremap_wc\>' --or \
	-e '\<ioremap_wc\>' --or \
	-e '\<ioremap_wt\>' --or \
	-e '\<ioport_map\>' --or \
	-e '\<ioport_unmap\>' --or \
	-e '\<ioport_map\>' --or \
	-e '\<ioport_unmap\>' --or \
	-e '\<xlate_dev_kmem_ptr\>' --or \
	-e '\<xlate_dev_mem_ptr\>' --or \
	-e '\<unxlate_dev_mem_ptr\>' --or \
	-e '\<virt_to_bus\>' --or \
	-e '\<bus_to_virt\>' --or \
	-e '\<memset_io\>' --or \
	-e '\<memcpy_fromio\>' --or \
	-e '\<memcpy_toio\>'

I also reordered a couple includes when they weren't alphabetical and
removed clk.h from kona, replacing it with clk-provider.h because
that driver doesn't use clk consumer APIs.
Acked-by: NGeert Uytterhoeven <geert+renesas@glider.be>
Cc: Chen-Yu Tsai <wens@csie.org>
Acked-by: NMaxime Ripard <maxime.ripard@bootlin.com>
Acked-by: NTero Kristo <t-kristo@ti.com>
Acked-by: NSekhar Nori <nsekhar@ti.com>
Cc: Krzysztof Kozlowski <krzk@kernel.org>
Acked-by: NMark Brown <broonie@kernel.org>
Cc: Chris Zankel <chris@zankel.net>
Acked-by: NMax Filippov <jcmvbkbc@gmail.com>
Acked-by: NJohn Crispin <john@phrozen.org>
Acked-by: NHeiko Stuebner <heiko@sntech.de>
Signed-off-by: NStephen Boyd <sboyd@kernel.org>
      62e59c4e
    • D
      Add wait_var_event_interruptible() · a49294ea
      由 David Howells 提交于 
      Add wait_var_event_interruptible() to allow interruptible waits for events.
Signed-off-by: NDavid Howells <dhowells@redhat.com>
Acked-by: NPeter Zijlstra (Intel) <peterz@infradead.org>
      a49294ea
    • D
      dns_resolver: Allow used keys to be invalidated · d0660f0b
      由 David Howells 提交于 
      Allow used DNS resolver keys to be invalidated after use if the caller is
doing its own caching of the results.  This reduces the amount of resources
required.

Fix AFS to invalidate DNS results to kill off permanent failure records
that get lodged in the resolver keyring and prevent future lookups from
happening.

Fixes: 0a5143f2 ("afs: Implement VL server rotation")
Signed-off-by: NDavid Howells <dhowells@redhat.com>
      d0660f0b
  19. 15 5月, 2019 15 次提交