- 28 Jun, 2022 1 commit
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John Fastabend authored
syzbot reproduced the bug ... BUG: sleeping function called from invalid context at kernel/workqueue.c:3010 ... with the following stack trace fragment ... start_flush_work kernel/workqueue.c:3010 [inline] __flush_work+0x109/0xb10 kernel/workqueue.c:3074 __cancel_work_timer+0x3f9/0x570 kernel/workqueue.c:3162 sk_psock_stop+0x4cb/0x630 net/core/skmsg.c:802 sock_map_destroy+0x333/0x760 net/core/sock_map.c:1581 inet_csk_destroy_sock+0x196/0x440 net/ipv4/inet_connection_sock.c:1130 __tcp_close+0xd5b/0x12b0 net/ipv4/tcp.c:2897 tcp_close+0x29/0xc0 net/ipv4/tcp.c:2909 ... introduced by d8616ee2. Do a quick trace of the code path and the bug is obvious: inet_csk_destroy_sock(sk) sk_prot->destroy(sk); <--- sock_map_destroy sk_psock_stop(, true); <--- true so cancel workqueue cancel_work_sync() <--- splat, because *_bh_disable() We can not call cancel_work_sync() from inside destroy path. So mark the sk_psock_stop call to skip this cancel_work_sync(). This will avoid the BUG, but means we may run sk_psock_backlog after or during the destroy op. We zapped the ingress_skb queue in sk_psock_stop (safe to do with local_bh_disable) so its empty and the sk_psock_backlog work item will not find any pkts to process here. However, because we are not going to wait for it or clear its ->state its possible it kicks off or is already running. This should be 'safe' up until psock drops its refcnt to psock->sk. The sock_put() that drops this reference is only done at psock destroy time from sk_psock_destroy(). This is done through workqueue when sk_psock_drop() is called on psock refnt reaches 0. And importantly sk_psock_destroy() does a cancel_work_sync(). So trivial fix works. I've had hit or miss luck reproducing this caught it once or twice with the provided reproducer when running with many runners. However, syzkaller is very good at reproducing so relying on syzkaller to verify fix. Fixes: d8616ee2 ("bpf, sockmap: Fix sk->sk_forward_alloc warn_on in sk_stream_kill_queues") Reported-by: syzbot+140186ceba0c496183bc@syzkaller.appspotmail.com Suggested-by:
Hillf Danton <hdanton@sina.com> Signed-off-by:
John Fastabend <john.fastabend@gmail.com> Signed-off-by:
Daniel Borkmann <daniel@iogearbox.net> Cc: Wang Yufen <wangyufen@huawei.com> Link: https://lore.kernel.org/bpf/20220628035803.317876-1-john.fastabend@gmail.com
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- 24 Jun, 2022 7 commits
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Daniel Müller authored
BPF type compatibility checks (bpf_core_types_are_compat()) are currently duplicated between kernel and user space. That's a historical artifact more than intentional doing and can lead to subtle bugs where one implementation is adjusted but another is forgotten. That happened with the enum64 work, for example, where the libbpf side was changed (commit 23b2a3a8 ("libbpf: Add enum64 relocation support")) to use the btf_kind_core_compat() helper function but the kernel side was not (commit 6089fb32 ("bpf: Add btf enum64 support")). This patch addresses both the duplication issue, by merging both implementations and moving them into relo_core.c, and fixes the alluded to kind check (by giving preference to libbpf's already adjusted logic). For discussion of the topic, please refer to: https://lore.kernel.org/bpf/CAADnVQKbWR7oarBdewgOBZUPzryhRYvEbkhyPJQHHuxq=0K1gw@mail.gmail.com/T/#mcc99f4a33ad9a322afaf1b9276fb1f0b7add9665 Changelog: v1 -> v2: - limited libbpf recursion limit to 32 - changed name to __bpf_core_types_are_compat - included warning previously present in libbpf version - merged kernel and user space changes into a single patch Signed-off-by:
Daniel Müller <deso@posteo.net> Signed-off-by:
Andrii Nakryiko <andrii@kernel.org> Link: https://lore.kernel.org/bpf/20220623182934.2582827-1-deso@posteo.net
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Shahab Vahedi authored
A minor typo fix to include "| BPF_LD" into its previous code phrase: ``BPF_IND`` | BPF_LD --> ``BPF_IND | BPF_LD`` Signed-off-by:
Shahab Vahedi <shahab@synopsys.com> Signed-off-by:
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Andrii Nakryiko authored
Jiri Olsa says: ==================== hi, sending change we discussed some time ago [1] to get rid of some deprecated functions we use in perf prologue code. Despite the gloomy discussion I think the final code does not look that bad ;-) This patchset removes following libbpf functions from perf: bpf_program__set_prep bpf_program__nth_fd struct bpf_prog_prep_result v5 changes: - squashed patches together so we don't break bisection [Arnaldo] v4 changes: - fix typo [Andrii] v3 changes: - removed R0/R1 zero init in libbpf_prog_prepare_load_fn, because it's not needed [Andrii] - rebased/post on top of bpf-next/master which now has all the needed perf/core changes v2 changes: - use fallback section prog handler, so we don't need to use section prefix [Andrii] - realloc prog->insns array in bpf_program__set_insns [Andrii] - squash patch 1 from previous version with bpf_program__set_insns change [Daniel] - patch 3 already merged [Arnaldo] - added more comments thanks, jirka [1] https://lore.kernel.org/bpf/CAEf4BzaiBO3_617kkXZdYJ8hS8YF--ZLgapNbgeeEJ-pY0H88g@mail.gmail.com/ ==================== Signed-off-by: -
Jiri Olsa authored
Some functions we use for bpf prologue generation are going to be deprecated. This change reworks current code not to use them. We need to replace following functions/struct: bpf_program__set_prep bpf_program__nth_fd struct bpf_prog_prep_result Currently we use bpf_program__set_prep to hook perf callback before program is loaded and provide new instructions with the prologue. We replace this function/ality by taking instructions for specific program, attaching prologue to them and load such new ebpf programs with prologue using separate bpf_prog_load calls (outside libbpf load machinery). Before we can take and use program instructions, we need libbpf to actually load it. This way we get the final shape of its instructions with all relocations and verifier adjustments). There's one glitch though.. perf kprobe program already assumes generated prologue code with proper values in argument registers, so loading such program directly will fail in the verifier. That's where the fallback pre-load handler fits in and prepends the initialization code to the program. Once such program is loaded we take its instructions, cut off the initialization code and prepend the prologue. I know.. sorry ;-) To have access to the program when loading this patch adds support to register 'fallback' section handler to take care of perf kprobe programs. The fallback means that it handles any section definition besides the ones that libbpf handles. The handler serves two purposes: - allows perf programs to have special arguments in section name - allows perf to use pre-load callback where we can attach init code (zeroing all argument registers) to each perf program Suggested-by:Jiri Olsa <jolsa@kernel.org> Signed-off-by:
Arnaldo Carvalho de Melo <acme@redhat.com> Acked-by:
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Eduard Zingerman authored
This test verifies that bpf_loop() inlining works as expected when address of `env->prog` is updated. This address is updated upon BPF program reallocation. Reallocation is handled by bpf_prog_realloc(), which reuses old memory if page boundary is not crossed. The value of `len` in the test is chosen to cross this boundary on bpf_loop() patching. Verify that the use-after-free bug in inline_bpf_loop() reported by Dan Carpenter is fixed. Signed-off-by:
Eduard Zingerman <eddyz87@gmail.com> Signed-off-by:
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Eduard Zingerman authored
As reported by Dan Carpenter, the following statements in inline_bpf_loop() might cause a use-after-free bug: struct bpf_prog *new_prog; // ... new_prog = bpf_patch_insn_data(env, position, insn_buf, *cnt); // ... env->prog->insnsi[call_insn_offset].imm = callback_offset; The bpf_patch_insn_data() might free the memory used by env->prog. Fixes: 1ade2371 ("bpf: Inline calls to bpf_loop when callback is known") Reported-by:
Dan Carpenter <dan.carpenter@oracle.com> Signed-off-by:
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Simon Wang authored
Enhance readability a bit. Signed-off-by:
Simon Wang <wangchuanguo@inspur.com> Signed-off-by:
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- 23 Jun, 2022 9 commits
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Jörn-Thorben Hinz authored
test_sock_fields__detach() got called with a null pointer here when one of the CHECKs or ASSERTs up to the test_sock_fields__open_and_load() call resulted in a jump to the "done" label. A skeletons *__detach() is not safe to call with a null pointer, though. This led to a segfault. Go the easy route and only call test_sock_fields__destroy() which is null-pointer safe and includes detaching. Came across this while looking[1] to introduce the usage of bpf_tcp_helpers.h (included in progs/test_sock_fields.c) together with vmlinux.h. [1] https://lore.kernel.org/bpf/629bc069dd807d7ac646f836e9dca28bbc1108e2.camel@mailbox.tu-berlin.de/ Fixes: 8f50f16f ("selftests/bpf: Extend verifier and bpf_sock tests for dst_port loads") Signed-off-by:
Jörn-Thorben Hinz <jthinz@mailbox.tu-berlin.de> Signed-off-by:
Jakub Sitnicki <jakub@cloudflare.com> Reviewed-by:
Martin KaFai Lau <kafai@fb.com> Acked-by:
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Alexei Starovoitov authored
Jörn-Thorben Hinz says: ==================== This series corrects some inconveniences for a BPF TCP CC that implements and uses tcp_congestion_ops.cong_control(). Until now, such a CC did not have all necessary write access to struct sock and unnecessarily needed to implement cong_avoid(). v4: - Remove braces around single statements after if - Don’t check pointer passed to bpf_link__destroy() v3: - Add a selftest writing sk_pacing_* - Add a selftest with incomplete tcp_congestion_ops - Add a selftest with unsupported get_info() - Remove an unused variable - Reword a comment about reg() in bpf_struct_ops_map_update_elem() v2: - Drop redundant check for required functions and just rely on tcp_register_congestion_control() (Martin KaFai Lau) ==================== Reviewed-by:
Alexei Starovoitov <ast@kernel.org>
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Jörn-Thorben Hinz authored
Test whether a TCP CC implemented in BPF providing get_info() is rejected correctly. get_info() is unsupported in a BPF CC. The check for required functions in a BPF CC has moved, this test ensures unsupported functions are still rejected correctly. Signed-off-by:
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Jörn-Thorben Hinz authored
Test whether a TCP CC implemented in BPF providing neither cong_avoid() nor cong_control() is correctly rejected. This check solely depends on tcp_register_congestion_control() now, which is invoked during bpf_map__attach_struct_ops(). Signed-off-by:
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Jörn-Thorben Hinz authored
Test whether a TCP CC implemented in BPF is allowed to write sk_pacing_rate and sk_pacing_status in struct sock. This is needed when cong_control() is implemented and used. Signed-off-by:
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Jörn-Thorben Hinz authored
Remove the check for required and optional functions in a struct tcp_congestion_ops from bpf_tcp_ca.c. Rely on tcp_register_congestion_control() to reject a BPF CC that does not implement all required functions, as it will do for a non-BPF CC. When a CC implements tcp_congestion_ops.cong_control(), the alternate cong_avoid() is not in use in the TCP stack. Previously, a BPF CC was still forced to implement cong_avoid() as a no-op since it was non-optional in bpf_tcp_ca.c. Signed-off-by:
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Jörn-Thorben Hinz authored
A CC that implements tcp_congestion_ops.cong_control() should be able to control sk_pacing_rate and set sk_pacing_status, since tcp_update_pacing_rate() is never called in this case. A built-in CC or one from a kernel module is already able to write to both struct sock members. For a BPF program, write access has not been allowed, yet. Signed-off-by:
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Jian Shen authored
The prototype of .features is netdev_features_t, it should use NETIF_F_LLTX and NETIF_F_HW_VLAN_STAG_TX, not NETIF_F_LLTX_BIT and NETIF_F_HW_VLAN_STAG_TX_BIT. Fixes: cf204a71 ("bpf, testing: Introduce 'gso_linear_no_head_frag' skb_segment test") Signed-off-by:
Jian Shen <shenjian15@huawei.com> Acked-by:
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Dave Marchevsky authored
Add a benchmarks to demonstrate the performance cliff for local_storage get as the number of local_storage maps increases beyond current local_storage implementation's cache size. "sequential get" and "interleaved get" benchmarks are added, both of which do many bpf_task_storage_get calls on sets of task local_storage maps of various counts, while considering a single specific map to be 'important' and counting task_storage_gets to the important map separately in addition to normal 'hits' count of all gets. Goal here is to mimic scenario where a particular program using one map - the important one - is running on a system where many other local_storage maps exist and are accessed often. While "sequential get" benchmark does bpf_task_storage_get for map 0, 1, ..., {9, 99, 999} in order, "interleaved" benchmark interleaves 4 bpf_task_storage_gets for the important map for every 10 map gets. This is meant to highlight performance differences when important map is accessed far more frequently than non-important maps. A "hashmap control" benchmark is also included for easy comparison of standard bpf hashmap lookup vs local_storage get. The benchmark is similar to "sequential get", but creates and uses BPF_MAP_TYPE_HASH instead of local storage. Only one inner map is created - a hashmap meant to hold tid -> data mapping for all tasks. Size of the hashmap is hardcoded to my system's PID_MAX_LIMIT (4,194,304). The number of these keys which are actually fetched as part of the benchmark is configurable. Addition of this benchmark is inspired by conversation with Alexei in a previous patchset's thread [0], which highlighted the need for such a benchmark to motivate and validate improvements to local_storage implementation. My approach in that series focused on improving performance for explicitly-marked 'important' maps and was rejected with feedback to make more generally-applicable improvements while avoiding explicitly marking maps as important. Thus the benchmark reports both general and important-map-focused metrics, so effect of future work on both is clear. Regarding the benchmark results. On a powerful system (Skylake, 20 cores, 256gb ram): Hashmap Control =============== num keys: 10 hashmap (control) sequential get: hits throughput: 20.900 ± 0.334 M ops/s, hits latency: 47.847 ns/op, important_hits throughput: 20.900 ± 0.334 M ops/s num keys: 1000 hashmap (control) sequential get: hits throughput: 13.758 ± 0.219 M ops/s, hits latency: 72.683 ns/op, important_hits throughput: 13.758 ± 0.219 M ops/s num keys: 10000 hashmap (control) sequential get: hits throughput: 6.995 ± 0.034 M ops/s, hits latency: 142.959 ns/op, important_hits throughput: 6.995 ± 0.034 M ops/s num keys: 100000 hashmap (control) sequential get: hits throughput: 4.452 ± 0.371 M ops/s, hits latency: 224.635 ns/op, important_hits throughput: 4.452 ± 0.371 M ops/s num keys: 4194304 hashmap (control) sequential get: hits throughput: 3.043 ± 0.033 M ops/s, hits latency: 328.587 ns/op, important_hits throughput: 3.043 ± 0.033 M ops/s Local Storage ============= num_maps: 1 local_storage cache sequential get: hits throughput: 47.298 ± 0.180 M ops/s, hits latency: 21.142 ns/op, important_hits throughput: 47.298 ± 0.180 M ops/s local_storage cache interleaved get: hits throughput: 55.277 ± 0.888 M ops/s, hits latency: 18.091 ns/op, important_hits throughput: 55.277 ± 0.888 M ops/s num_maps: 10 local_storage cache sequential get: hits throughput: 40.240 ± 0.802 M ops/s, hits latency: 24.851 ns/op, important_hits throughput: 4.024 ± 0.080 M ops/s local_storage cache interleaved get: hits throughput: 48.701 ± 0.722 M ops/s, hits latency: 20.533 ns/op, important_hits throughput: 17.393 ± 0.258 M ops/s num_maps: 16 local_storage cache sequential get: hits throughput: 44.515 ± 0.708 M ops/s, hits latency: 22.464 ns/op, important_hits throughput: 2.782 ± 0.044 M ops/s local_storage cache interleaved get: hits throughput: 49.553 ± 2.260 M ops/s, hits latency: 20.181 ns/op, important_hits throughput: 15.767 ± 0.719 M ops/s num_maps: 17 local_storage cache sequential get: hits throughput: 38.778 ± 0.302 M ops/s, hits latency: 25.788 ns/op, important_hits throughput: 2.284 ± 0.018 M ops/s local_storage cache interleaved get: hits throughput: 43.848 ± 1.023 M ops/s, hits latency: 22.806 ns/op, important_hits throughput: 13.349 ± 0.311 M ops/s num_maps: 24 local_storage cache sequential get: hits throughput: 19.317 ± 0.568 M ops/s, hits latency: 51.769 ns/op, important_hits throughput: 0.806 ± 0.024 M ops/s local_storage cache interleaved get: hits throughput: 24.397 ± 0.272 M ops/s, hits latency: 40.989 ns/op, important_hits throughput: 6.863 ± 0.077 M ops/s num_maps: 32 local_storage cache sequential get: hits throughput: 13.333 ± 0.135 M ops/s, hits latency: 75.000 ns/op, important_hits throughput: 0.417 ± 0.004 M ops/s local_storage cache interleaved get: hits throughput: 16.898 ± 0.383 M ops/s, hits latency: 59.178 ns/op, important_hits throughput: 4.717 ± 0.107 M ops/s num_maps: 100 local_storage cache sequential get: hits throughput: 6.360 ± 0.107 M ops/s, hits latency: 157.233 ns/op, important_hits throughput: 0.064 ± 0.001 M ops/s local_storage cache interleaved get: hits throughput: 7.303 ± 0.362 M ops/s, hits latency: 136.930 ns/op, important_hits throughput: 1.907 ± 0.094 M ops/s num_maps: 1000 local_storage cache sequential get: hits throughput: 0.452 ± 0.010 M ops/s, hits latency: 2214.022 ns/op, important_hits throughput: 0.000 ± 0.000 M ops/s local_storage cache interleaved get: hits throughput: 0.542 ± 0.007 M ops/s, hits latency: 1843.341 ns/op, important_hits throughput: 0.136 ± 0.002 M ops/s Looking at the "sequential get" results, it's clear that as the number of task local_storage maps grows beyond the current cache size (16), there's a significant reduction in hits throughput. Note that current local_storage implementation assigns a cache_idx to maps as they are created. Since "sequential get" is creating maps 0..n in order and then doing bpf_task_storage_get calls in the same order, the benchmark is effectively ensuring that a map will not be in cache when the program tries to access it. For "interleaved get" results, important-map hits throughput is greatly increased as the important map is more likely to be in cache by virtue of being accessed far more frequently. Throughput still reduces as # maps increases, though. To get a sense of the overhead of the benchmark program, I commented out bpf_task_storage_get/bpf_map_lookup_elem in local_storage_bench.c and ran the benchmark on the same host as the 'real' run. Results: Hashmap Control =============== num keys: 10 hashmap (control) sequential get: hits throughput: 54.288 ± 0.655 M ops/s, hits latency: 18.420 ns/op, important_hits throughput: 54.288 ± 0.655 M ops/s num keys: 1000 hashmap (control) sequential get: hits throughput: 52.913 ± 0.519 M ops/s, hits latency: 18.899 ns/op, important_hits throughput: 52.913 ± 0.519 M ops/s num keys: 10000 hashmap (control) sequential get: hits throughput: 53.480 ± 1.235 M ops/s, hits latency: 18.699 ns/op, important_hits throughput: 53.480 ± 1.235 M ops/s num keys: 100000 hashmap (control) sequential get: hits throughput: 54.982 ± 1.902 M ops/s, hits latency: 18.188 ns/op, important_hits throughput: 54.982 ± 1.902 M ops/s num keys: 4194304 hashmap (control) sequential get: hits throughput: 50.858 ± 0.707 M ops/s, hits latency: 19.662 ns/op, important_hits throughput: 50.858 ± 0.707 M ops/s Local Storage ============= num_maps: 1 local_storage cache sequential get: hits throughput: 110.990 ± 4.828 M ops/s, hits latency: 9.010 ns/op, important_hits throughput: 110.990 ± 4.828 M ops/s local_storage cache interleaved get: hits throughput: 161.057 ± 4.090 M ops/s, hits latency: 6.209 ns/op, important_hits throughput: 161.057 ± 4.090 M ops/s num_maps: 10 local_storage cache sequential get: hits throughput: 112.930 ± 1.079 M ops/s, hits latency: 8.855 ns/op, important_hits throughput: 11.293 ± 0.108 M ops/s local_storage cache interleaved get: hits throughput: 115.841 ± 2.088 M ops/s, hits latency: 8.633 ns/op, important_hits throughput: 41.372 ± 0.746 M ops/s num_maps: 16 local_storage cache sequential get: hits throughput: 115.653 ± 0.416 M ops/s, hits latency: 8.647 ns/op, important_hits throughput: 7.228 ± 0.026 M ops/s local_storage cache interleaved get: hits throughput: 138.717 ± 1.649 M ops/s, hits latency: 7.209 ns/op, important_hits throughput: 44.137 ± 0.525 M ops/s num_maps: 17 local_storage cache sequential get: hits throughput: 112.020 ± 1.649 M ops/s, hits latency: 8.927 ns/op, important_hits throughput: 6.598 ± 0.097 M ops/s local_storage cache interleaved get: hits throughput: 128.089 ± 1.960 M ops/s, hits latency: 7.807 ns/op, important_hits throughput: 38.995 ± 0.597 M ops/s num_maps: 24 local_storage cache sequential get: hits throughput: 92.447 ± 5.170 M ops/s, hits latency: 10.817 ns/op, important_hits throughput: 3.855 ± 0.216 M ops/s local_storage cache interleaved get: hits throughput: 128.844 ± 2.808 M ops/s, hits latency: 7.761 ns/op, important_hits throughput: 36.245 ± 0.790 M ops/s num_maps: 32 local_storage cache sequential get: hits throughput: 102.042 ± 1.462 M ops/s, hits latency: 9.800 ns/op, important_hits throughput: 3.194 ± 0.046 M ops/s local_storage cache interleaved get: hits throughput: 126.577 ± 1.818 M ops/s, hits latency: 7.900 ns/op, important_hits throughput: 35.332 ± 0.507 M ops/s num_maps: 100 local_storage cache sequential get: hits throughput: 111.327 ± 1.401 M ops/s, hits latency: 8.983 ns/op, important_hits throughput: 1.113 ± 0.014 M ops/s local_storage cache interleaved get: hits throughput: 131.327 ± 1.339 M ops/s, hits latency: 7.615 ns/op, important_hits throughput: 34.302 ± 0.350 M ops/s num_maps: 1000 local_storage cache sequential get: hits throughput: 101.978 ± 0.563 M ops/s, hits latency: 9.806 ns/op, important_hits throughput: 0.102 ± 0.001 M ops/s local_storage cache interleaved get: hits throughput: 141.084 ± 1.098 M ops/s, hits latency: 7.088 ns/op, important_hits throughput: 35.430 ± 0.276 M ops/s Adjusting for overhead, latency numbers for "hashmap control" and "sequential get" are: hashmap_control_1k: ~53.8ns hashmap_control_10k: ~124.2ns hashmap_control_100k: ~206.5ns sequential_get_1: ~12.1ns sequential_get_10: ~16.0ns sequential_get_16: ~13.8ns sequential_get_17: ~16.8ns sequential_get_24: ~40.9ns sequential_get_32: ~65.2ns sequential_get_100: ~148.2ns sequential_get_1000: ~2204ns Clearly demonstrating a cliff. In the discussion for v1 of this patch, Alexei noted that local_storage was 2.5x faster than a large hashmap when initially implemented [1]. The benchmark results show that local_storage is 5-10x faster: a long-running BPF application putting some pid-specific info into a hashmap for each pid it sees will probably see on the order of 10-100k pids. Bench numbers for hashmaps of this size are ~10x slower than sequential_get_16, but as the number of local_storage maps grows far past local_storage cache size the performance advantage shrinks and eventually reverses. When running the benchmarks it may be necessary to bump 'open files' ulimit for a successful run. [0]: https://lore.kernel.org/all/20220420002143.1096548-1-davemarchevsky@fb.com [1]: https://lore.kernel.org/bpf/20220511173305.ftldpn23m4ski3d3@MBP-98dd607d3435.dhcp.thefacebook.com/Signed-off-by:Dave Marchevsky <davemarchevsky@fb.com> Link: https://lore.kernel.org/r/20220620222554.270578-1-davemarchevsky@fb.comSigned-off-by:
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- 22 Jun, 2022 1 commit
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Andy Gospodarek authored
This changes the section name for the bpf program embedded in these files to "xdp.frags" to allow the programs to be loaded on drivers that are using an MTU greater than PAGE_SIZE. Rather than directly accessing the buffers, the packet data is now accessed via xdp helper functions to provide an example for those who may need to write more complex programs. v2: remove new unnecessary variable Signed-off-by:
Andy Gospodarek <gospo@broadcom.com> Acked-by:
Lorenzo Bianconi <lorenzo@kernel.org> Link: https://lore.kernel.org/r/20220621175402.35327-1-gospo@broadcom.comSigned-off-by:
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- 21 Jun, 2022 9 commits
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Jakub Sitnicki authored
Today doing a BPF tail call after a BPF to BPF call, that is from a subprogram, is allowed only by the x86-64 BPF JIT. Mixing these features requires support from JIT. Tail call count has to be tracked through BPF to BPF calls, as well as through BPF tail calls to prevent unbounded chains of tail calls. arm64 BPF JIT stores the tail call count (TCC) in a dedicated register (X26). This makes it easier to support bpf2bpf calls mixed with tail calls than on x86 platform. In order to keep the tail call count in tact throughout bpf2bpf calls, all we need to do is tweak the program prologue generator. When emitting prologue for a subprogram, we skip the block that initializes the tail call count and emits a jump pad for the tail call. With this change, a sample execution flow where a bpf2bpf call is followed by a tail call would look like so: int entry(struct __sk_buff *skb): 0xffffffc0090151d4: paciasp 0xffffffc0090151d8: stp x29, x30, [sp, #-16]! 0xffffffc0090151dc: mov x29, sp 0xffffffc0090151e0: stp x19, x20, [sp, #-16]! 0xffffffc0090151e4: stp x21, x22, [sp, #-16]! 0xffffffc0090151e8: stp x25, x26, [sp, #-16]! 0xffffffc0090151ec: stp x27, x28, [sp, #-16]! 0xffffffc0090151f0: mov x25, sp 0xffffffc0090151f4: mov x26, #0x0 // <- init TCC only 0xffffffc0090151f8: bti j // in main prog 0xffffffc0090151fc: sub x27, x25, #0x0 0xffffffc009015200: sub sp, sp, #0x10 0xffffffc009015204: mov w1, #0x0 0xffffffc009015208: mov x10, #0xffffffffffffffff 0xffffffc00901520c: strb w1, [x25, x10] 0xffffffc009015210: mov x10, #0xffffffffffffd25c 0xffffffc009015214: movk x10, #0x902, lsl #16 0xffffffc009015218: movk x10, #0xffc0, lsl #32 0xffffffc00901521c: blr x10 -------------------. // bpf2bpf call 0xffffffc009015220: add x7, x0, #0x0 <-------------. 0xffffffc009015224: add sp, sp, #0x10 | | 0xffffffc009015228: ldp x27, x28, [sp], #16 | | 0xffffffc00901522c: ldp x25, x26, [sp], #16 | | 0xffffffc009015230: ldp x21, x22, [sp], #16 | | 0xffffffc009015234: ldp x19, x20, [sp], #16 | | 0xffffffc009015238: ldp x29, x30, [sp], #16 | | 0xffffffc00901523c: add x0, x7, #0x0 | | 0xffffffc009015240: autiasp | | 0xffffffc009015244: ret | | | | int subprog_tail(struct __sk_buff *skb): | | 0xffffffc00902d25c: paciasp <----------------------' | 0xffffffc00902d260: stp x29, x30, [sp, #-16]! | 0xffffffc00902d264: mov x29, sp | 0xffffffc00902d268: stp x19, x20, [sp, #-16]! | 0xffffffc00902d26c: stp x21, x22, [sp, #-16]! | 0xffffffc00902d270: stp x25, x26, [sp, #-16]! | 0xffffffc00902d274: stp x27, x28, [sp, #-16]! | 0xffffffc00902d278: mov x25, sp | 0xffffffc00902d27c: sub x27, x25, #0x0 | 0xffffffc00902d280: sub sp, sp, #0x10 | // <- end of prologue, notice: 0xffffffc00902d284: add x19, x0, #0x0 | // 1) TCC not touched, and 0xffffffc00902d288: mov w0, #0x1 | // 2) no tail call jump pad 0xffffffc00902d28c: mov x10, #0xfffffffffffffffc | 0xffffffc00902d290: str w0, [x25, x10] | 0xffffffc00902d294: mov x20, #0xffffff80ffffffff | 0xffffffc00902d298: movk x20, #0xc033, lsl #16 | 0xffffffc00902d29c: movk x20, #0x4e00 | 0xffffffc00902d2a0: add x0, x19, #0x0 | 0xffffffc00902d2a4: add x1, x20, #0x0 | 0xffffffc00902d2a8: mov x2, #0x0 | 0xffffffc00902d2ac: mov w10, #0x24 | 0xffffffc00902d2b0: ldr w10, [x1, x10] | 0xffffffc00902d2b4: add w2, w2, #0x0 | 0xffffffc00902d2b8: cmp w2, w10 | 0xffffffc00902d2bc: b.cs 0xffffffc00902d2f8 | 0xffffffc00902d2c0: mov w10, #0x21 | 0xffffffc00902d2c4: cmp x26, x10 | // TCC >= MAX_TAIL_CALL_CNT? 0xffffffc00902d2c8: b.cs 0xffffffc00902d2f8 | 0xffffffc00902d2cc: add x26, x26, #0x1 | // TCC++ 0xffffffc00902d2d0: mov w10, #0x110 | 0xffffffc00902d2d4: add x10, x1, x10 | 0xffffffc00902d2d8: lsl x11, x2, #3 | 0xffffffc00902d2dc: ldr x11, [x10, x11] | 0xffffffc00902d2e0: cbz x11, 0xffffffc00902d2f8 | 0xffffffc00902d2e4: mov w10, #0x30 | 0xffffffc00902d2e8: ldr x10, [x11, x10] | 0xffffffc00902d2ec: add x10, x10, #0x24 | 0xffffffc00902d2f0: add sp, sp, #0x10 | // <- destroy just current 0xffffffc00902d2f4: br x10 ---------------------. | // BPF stack frame 0xffffffc00902d2f8: mov x10, #0xfffffffffffffffc | | // before the tail call 0xffffffc00902d2fc: ldr w7, [x25, x10] | | 0xffffffc00902d300: add sp, sp, #0x10 | | 0xffffffc00902d304: ldp x27, x28, [sp], #16 | | 0xffffffc00902d308: ldp x25, x26, [sp], #16 | | 0xffffffc00902d30c: ldp x21, x22, [sp], #16 | | 0xffffffc00902d310: ldp x19, x20, [sp], #16 | | 0xffffffc00902d314: ldp x29, x30, [sp], #16 | | 0xffffffc00902d318: add x0, x7, #0x0 | | 0xffffffc00902d31c: autiasp | | 0xffffffc00902d320: ret | | | | int classifier_0(struct __sk_buff *skb): | | 0xffffffc008ff5874: paciasp | | 0xffffffc008ff5878: stp x29, x30, [sp, #-16]! | | 0xffffffc008ff587c: mov x29, sp | | 0xffffffc008ff5880: stp x19, x20, [sp, #-16]! | | 0xffffffc008ff5884: stp x21, x22, [sp, #-16]! | | 0xffffffc008ff5888: stp x25, x26, [sp, #-16]! | | 0xffffffc008ff588c: stp x27, x28, [sp, #-16]! | | 0xffffffc008ff5890: mov x25, sp | | 0xffffffc008ff5894: mov x26, #0x0 | | 0xffffffc008ff5898: bti j <----------------------' | 0xffffffc008ff589c: sub x27, x25, #0x0 | 0xffffffc008ff58a0: sub sp, sp, #0x0 | 0xffffffc008ff58a4: mov x0, #0xffffffc0ffffffff | 0xffffffc008ff58a8: movk x0, #0x8fc, lsl #16 | 0xffffffc008ff58ac: movk x0, #0x6000 | 0xffffffc008ff58b0: mov w1, #0x1 | 0xffffffc008ff58b4: str w1, [x0] | 0xffffffc008ff58b8: mov w7, #0x0 | 0xffffffc008ff58bc: mov sp, sp | 0xffffffc008ff58c0: ldp x27, x28, [sp], #16 | 0xffffffc008ff58c4: ldp x25, x26, [sp], #16 | 0xffffffc008ff58c8: ldp x21, x22, [sp], #16 | 0xffffffc008ff58cc: ldp x19, x20, [sp], #16 | 0xffffffc008ff58d0: ldp x29, x30, [sp], #16 | 0xffffffc008ff58d4: add x0, x7, #0x0 | 0xffffffc008ff58d8: autiasp | 0xffffffc008ff58dc: ret -------------------------------' Signed-off-by: -
Tony Ambardar authored
The BPF core/verifier is hard-coded to permit mixing bpf2bpf and tail calls for only x86-64. Change the logic to instead rely on a new weak function 'bool bpf_jit_supports_subprog_tailcalls(void)', which a capable JIT backend can override. Update the x86-64 eBPF JIT to reflect this. Signed-off-by:
Tony Ambardar <Tony.Ambardar@gmail.com> [jakub: drop MIPS bits and tweak patch subject] Signed-off-by:
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Alexei Starovoitov authored
Eduard Zingerman says: ==================== Hi Everyone, This is the next iteration of the patch. It includes changes suggested by Song, Joanne and Alexei. Please find updated intro message and change log below. This patch implements inlining of calls to bpf_loop helper function when bpf_loop's callback is statically known. E.g. the rewrite does the following transformation during BPF program processing: bpf_loop(10, foo, NULL, 0); -> for (int i = 0; i < 10; ++i) foo(i, NULL); The transformation leads to measurable latency change for simple loops. Measurements using `benchs/run_bench_bpf_loop.sh` inside QEMU / KVM on i7-4710HQ CPU show a drop in latency from 14 ns/op to 2 ns/op. The change is split in five parts: * Update to test_verifier.c to specify expected and unexpected instruction sequences. This allows to check BPF program rewrites applied by e.g. do_mix_fixups function. * Update to test_verifier.c to specify BTF function infos and types per test case. This is necessary for tests that load sub-program addresses to a variable because of the checks applied by check_ld_imm function. * The update to verifier.c that tracks state of the parameters for each bpf_loop call in a program and decides whether it could be replaced by a loop. * A set of test cases for `test_verifier` that use capabilities added by the first two patches to verify instructions produced by inlining logic. * Two test cases for `test_prog` to check that possible corner cases behave as expected. Additional details are available in commit messages for each patch. Changes since v7: - Call to `mark_chain_precision` is added in `loop_flag_is_zero` to avoid potential issues with state pruning and precision tracking. - `flags non-zero` test_verifier test case is updated to have two execution paths reaching `bpf_loop` call, one with flags = 0, another with flags = 1. Potentially this test case should be able to show that call to `mark_chain_precision` is necessary in `loop_flag_is_zero` but not at the moment. Please refer to discussion for [PATCH bpf-next v7 3/5] for additional details. - `stack_depth_extra` computation is updated to guarantee that R6, R7 and R8 offsets are always aligned on 8 byte boundary. - `stack locations for loop vars` test_verifier test case updated to show that R6, R7, R8 offsets are indeed aligned when function stack depth is not a multiple of 8. - I removed Song Liu's ACK from commit message for [PATCH bpf-next v8 4/5] because I updated the patch. (Please let me know if I had to keep the ACK tag). Changes since v6: - Return value of the `optimize_bpf_loop` function is no longer ignored. This is necessary to properly propagate -ENOMEM error. Changes since v5: - Added function `loop_flag_is_zero` to skip a few checks in `update_loop_inline_state` when loop instruction is not fit for inline. Changes since v4: - Added missing `static` modifier for `update_loop_inline_state` and `inline_bpf_loop` functions. - `update_loop_inline_state` updated for better readability. - Fields `initialized` and `fit_for_inline` of `struct bpf_loop_inline_state` are changed back from `bool` to bitfields. - Acks from Song Liu added to comments for patches 1/5, 2/5, 4/5, 5/5. Changes since v3: - Function `adjust_stack_depth_for_loop_inlining` is replaced by function `optimize_bpf_loop`. Function `optimize_bpf_loop` is responsible for both stack depth adjustment and call instruction replacement. - Changes in `do_misc_fixups` are reverted. - Changes in `adjust_subprog_starts_after_remove` are reverted and function `adjust_loop_inline_subprogno` is removed. This is possible because call to `optimize_bpf_loop` is placed before the dead code removal in `opt_remove_dead_code` (in contrast to the position of `do_misc_fixups` where inlining was done in v3). - Field `bpf_insn_aux_data.loop_inline_state` is now a part of anonymous union at the start of the `bpf_insn_aux_data`. - Data structure `bpf_loop_inline_state` is simplified to use single flag field `fit_for_inline` instead of separate fields `flags_is_zero` & `callback_is_constant`. - Macro definition `BPF_MAX_LOOPS` is moved from `include/linux/bpf_verifier.h` to `include/linux/bpf.h` to avoid include of `include/linux/bpf_verifier.h` in `bpf_iter.c`. - `inline_bpf_loop` changed back to use array initialization and hard coded offsets as in v2. - Style / formatting updates. Changes since v2: - fix for `stack_check` test case in `test_progs-no_alu32`, all tests are passing now; - v2 3/3 patch is split in three parts: - kernel changes - test_verifier changes - test_prog changes - updated `inline_bpf_loop` in `verifier.c` to calculate each offset used in instructions to avoid "magic" numbers; - removed newline handling logic in `fail_log` branch of `do_single_test` in `test_verifier.c` to simplify the patch set; - styling fixes suggested in review for v2 of this patch set. Changes since v1: - allow to use SKIP_INSNS in instruction pattern specification in test_verifier tests; - fix for a bug in spill offset assignement for loop vars when bpf_loop is located in a non-main function. ==================== Signed-off-by: -
Eduard Zingerman authored
Two new test BPF programs for test_prog selftests checking bpf_loop behavior. Both are corner cases for bpf_loop inlinig transformation: - check that bpf_loop behaves correctly when callback function is not a compile time constant - check that local function variables are not affected by allocating additional stack storage for registers spilled by loop inlining Signed-off-by:
Song Liu <songliubraving@fb.com> Link: https://lore.kernel.org/r/20220620235344.569325-6-eddyz87@gmail.comSigned-off-by:
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Eduard Zingerman authored
A number of test cases for BPF selftests test_verifier to check how bpf_loop inline transformation rewrites the BPF program. The following cases are covered: - happy path - no-rewrite when flags is non-zero - no-rewrite when callback is non-constant - subprogno in insn_aux is updated correctly when dead sub-programs are removed - check that correct stack offsets are assigned for spilling of R6-R8 registers Signed-off-by:
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Eduard Zingerman authored
Calls to `bpf_loop` are replaced with direct loops to avoid indirection. E.g. the following: bpf_loop(10, foo, NULL, 0); Is replaced by equivalent of the following: for (int i = 0; i < 10; ++i) foo(i, NULL); This transformation could be applied when: - callback is known and does not change during program execution; - flags passed to `bpf_loop` are always zero. Inlining logic works as follows: - During execution simulation function `update_loop_inline_state` tracks the following information for each `bpf_loop` call instruction: - is callback known and constant? - are flags constant and zero? - Function `optimize_bpf_loop` increases stack depth for functions where `bpf_loop` calls can be inlined and invokes `inline_bpf_loop` to apply the inlining. The additional stack space is used to spill registers R6, R7 and R8. These registers are used as loop counter, loop maximal bound and callback context parameter; Measurements using `benchs/run_bench_bpf_loop.sh` inside QEMU / KVM on i7-4710HQ CPU show a drop in latency from 14 ns/op to 2 ns/op. Signed-off-by: -
Eduard Zingerman authored
The BTF and func_info specification for test_verifier tests follows the same notation as in prog_tests/btf.c tests. E.g.: ... .func_info = { { 0, 6 }, { 8, 7 } }, .func_info_cnt = 2, .btf_strings = "\0int\0", .btf_types = { BTF_TYPE_INT_ENC(1, BTF_INT_SIGNED, 0, 32, 4), BTF_PTR_ENC(1), }, ... The BTF specification is loaded only when specified. Signed-off-by: -
Eduard Zingerman authored
Allows to specify expected and unexpected instruction sequences in test_verifier test cases. The instructions are requested from kernel after BPF program loading, thus allowing to check some of the transformations applied by BPF verifier. - `expected_insn` field specifies a sequence of instructions expected to be found in the program; - `unexpected_insn` field specifies a sequence of instructions that are not expected to be found in the program; - `INSN_OFF_MASK` and `INSN_IMM_MASK` values could be used to mask `off` and `imm` fields. - `SKIP_INSNS` could be used to specify that some instructions in the (un)expected pattern are not important (behavior similar to usage of `\t` in `errstr` field). The intended usage is as follows: { "inline simple bpf_loop call", .insns = { /* main */ BPF_ALU64_IMM(BPF_MOV, BPF_REG_1, 1), BPF_RAW_INSN(BPF_LD | BPF_IMM | BPF_DW, BPF_REG_2, BPF_PSEUDO_FUNC, 0, 6), ... BPF_EXIT_INSN(), /* callback */ BPF_ALU64_IMM(BPF_MOV, BPF_REG_0, 1), BPF_EXIT_INSN(), }, .expected_insns = { BPF_ALU64_IMM(BPF_MOV, BPF_REG_1, 1), SKIP_INSNS(), BPF_RAW_INSN(BPF_JMP | BPF_CALL, 0, BPF_PSEUDO_CALL, 8, 1) }, .unexpected_insns = { BPF_RAW_INSN(BPF_JMP | BPF_CALL, 0, 0, INSN_OFF_MASK, INSN_IMM_MASK), }, .prog_type = BPF_PROG_TYPE_TRACEPOINT, .result = ACCEPT, .runs = 0, }, Here it is expected that move of 1 to register 1 would remain in place and helper function call instruction would be replaced by a relative call instruction. Signed-off-by: -
Delyan Kratunov authored
The call into bpf from uprobes needs to be gated now that it doesn't use the trace_events.h helpers. Randy found this as a randconfig build failure on linux-next [1]. [1]: https://lore.kernel.org/linux-next/2de99180-7d55-2fdf-134d-33198c27cc58@infradead.org/Reported-by:
Randy Dunlap <rdunlap@infradead.org> Signed-off-by:
Delyan Kratunov <delyank@fb.com> Tested-by:
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- 20 Jun, 2022 13 commits
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Maxim Mikityanskiy authored
This commit adds the kernel config options needed to run the recently added xdp_synproxy test. Users without these options will hit errors like this: test_synproxy:FAIL:iptables -t raw -I PREROUTING -i tmp1 -p tcp -m tcp --syn --dport 8080 -j CT --notrack unexpected error: 256 (errno 22) Suggested-by:
Alexei Starovoitov <alexei.starovoitov@gmail.com> Signed-off-by:
Maxim Mikityanskiy <maximmi@nvidia.com> Signed-off-by:
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Cong Wang authored
We always allocate skmsg with kzalloc(), so there is no need to call memset(0) on it, the only thing we need from sk_msg_init() is sg_init_marker(). So introduce a new helper which is just kzalloc()+sg_init_marker(), this saves an unncessary memset(0) for skmsg on fast path. Signed-off-by:
Cong Wang <cong.wang@bytedance.com> Signed-off-by:
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Cong Wang authored
With ->read_skb() now we have an entire skb dequeued from receive queue, now we just need to grab an addtional refcnt before passing its ownership to recv actors. And we should not touch them any more, particularly for skb->sk. Fortunately, skb->sk is already set for most of the protocols except UDP where skb->sk has been stolen, so we have to fix it up for UDP case. Signed-off-by:
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Cong Wang authored
Currently both splice() and sockmap use ->read_sock() to read skb from receive queue, but for sockmap we only read one entire skb at a time, so ->read_sock() is too conservative to use. Introduce a new proto_ops ->read_skb() which supports this sematic, with this we can finally pass the ownership of skb to recv actors. For non-TCP protocols, all ->read_sock() can be simply converted to ->read_skb(). Signed-off-by:
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Cong Wang authored
This patch inroduces tcp_read_skb() based on tcp_read_sock(), a preparation for the next patch which actually introduces a new sock ops. TCP is special here, because it has tcp_read_sock() which is mainly used by splice(). tcp_read_sock() supports partial read and arbitrary offset, neither of them is needed for sockmap. Signed-off-by:
Eric Dumazet <edumazet@google.com> Reviewed-by:
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David S. Miller authored
Ido Schimmel says: ==================== mlxsw: Unified bridge conversion - part 1/6 This set starts converting mlxsw to the unified bridge model and mainly adds new device registers and extends existing ones that will be used in follow-up patchsets. High-level summary ================== The unified bridge model is a new way of managing low-level device objects such as filtering identifiers (FIDs). The conversion moves a lot of logic out of the device's firmware towards the driver, but its main selling point is that it allows to overcome various scalability issues related to the amount of entries that need to be programmed to the device. The only (intended) user visible changes of the conversion are improvement in resource utilization and ability to support more router interfaces (RIFs) in Spectrum-{2,3}. Details ======= Commit 50853808 ("Merge branch 'mlxsw-Prepare-for-VLAN-aware-bridge-w-VxLAN'") converted mlxsw to emulate 802.1Q FIDs (represent VLANs in a VLAN-aware bridge) using 802.1D FIDs (represent VLAN-unaware bridges). This was necessary because at that time VNI could not be assigned to 802.1Q FIDs, which effectively meant that mlxsw could not support VXLAN with VLAN-aware bridges. The downside of this approach is that multiple {Port,VID}->FID entries are required in order to classify incoming traffic to a FID, as opposed to a single VID->FID entry that can be used with actual 802.1Q FIDs. For example, if 10 ports are members in the same VLAN-aware bridge and the same 100 VLANs are configured on each port, then only 100 VID->FID entries are required with 802.1Q FIDs, whereas 1000 {Port,VID}->FID entries are required with emulated 802.1Q FIDs. The above limitation is the result of various assumptions that were made in the design of the API that was exposed to software. In the unified bridge model the API is much more "raw" and therefore avoids these assumptions, allowing software to configure the device in a more efficient manner. ==================== Signed-off-by:David S. Miller <davem@davemloft.net>
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Amit Cohen authored
Router interfaces (RIFs) constructed on top of VLAN-aware bridges are of "VLAN" type, whereas RIFs constructed on top of VLAN-unaware bridges of "FID" type. In other words, the RIF type is derived from the underlying FID type. VLAN RIFs are used on top of 802.1Q FIDs, whereas FID RIFs are used on top of 802.1D FIDs. Currently 802.1Q FIDs are emulated using 802.1D FIDs, and therefore VLAN RIFs are emulated using FID RIFs. As part of converting the driver to use unified bridge, 802.1Q FIDs and VLAN RIFs will be used. Add the relevant fields to RITR register, add pack() function for VLAN RIF and rename one field to fit the internal name. Signed-off-by:
Amit Cohen <amcohen@nvidia.com> Reviewed-by:
Petr Machata <petrm@nvidia.com> Signed-off-by:
Ido Schimmel <idosch@nvidia.com> Signed-off-by:
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Amit Cohen authored
As preparation for unified bridge model, add support for VNI->FID mapping via SVFA register. When performing VXLAN encapsulation, the VXLAN header needs to contain a VNI. This VNI is derived from the FID classification performed on ingress, through which the ingress RIF is also determined. Similarly, when performing VXLAN decapsulation, the FID of the packet needs to be determined. This FID is derived from VNI classification performed during decapsulation. In the old model, both entries (i.e., FID->VNI and VNI->FID) were configured via SFMR.vni. In the new model, where ingress is separated from egress, ingress configuration (VNI->FID) is performed via SVFA, while SFMR only configures egress (FID->VNI). Add 'vni' field to SVFA, add new mapping table - VNI to FID, add new pack() function for VNI mapping and edit the comment in SFMR. Signed-off-by:
Danielle Ratson <danieller@nvidia.com> Reviewed-by:
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Amit Cohen authored
RITR configures the router interface table. As preparation for unified bridge model, add egress FID field to RITR. After routing, a packet has to perform a layer-2 lookup using the destination MAC it got from the routing and a FID. In the new model, the egress FID is configured by RITR for both sub-port and FID RIFs. Add 'efid' field to sub-port router interface and update FID router interface related comment. Signed-off-by:
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Amit Cohen authored
The REIV maps {egress router interface (eRIF), egress_port} -> {vlan ID}. As preparation for unified bridge model, add REIV register for future use. In the past, firmware would take care of the above mentioned mapping, but in the new model this should be done by software using REIV register. REIV register supports a simultaneous update of 256 ports using 'port_page' field. When 'port_page'=0 the records represent ports 0-255, when 'port_page'=1 the records represent ports 256-511 and so on. The register is reserved while using the legacy model. Signed-off-by: -
Amit Cohen authored
SFGC register maps {packet type, bridge type} -> {MID base, table type}. As preparation for unified bridge model, remove 'mid' field and add 'mid_base' field. The MID index (index to PGT table which maps MID to local port list and SMPE index) is a result of 'mid_base' + 'fid_offset'. Using the legacy bridge model, firmware configures 'mid_base'. However, using the new model, software is responsible to configure it via SFGC register. The 'mid_base' is configured per {packet type, bridge type}, for example, for {Unicast, .1Q}, {Broadcast, .1D}. Add the field 'mid_base' to SFGC register and increase the length of the register accordingly. Remove the field 'mid' as currently it is ignored by the device, its use is an old leftover. Signed-off-by: -
Amit Cohen authored
SFMR register creates and configures FIDs. As preparation for unified bridge model, add a required field for future use. The PGT (Port Group) table maps multicast ID (MID) to {local port list, SMPE index} on Spectrum-1 and to {local port list} on the other ASICs. In the legacy model, software did not interact with this table directly. Instead, it was accessed by firmware in response to registers such as SFTR and SMID. In the new model, the SFTR register is deprecated and software has full control over the PGT table using the SMID register. The configuration of MDB entries (using SFD) is unchanged, but flooding configuration is completely different. SFGC register maps {packet type, bridge type} -> {MID base, table type}, then with FID and FID-offset which are configured via SFMR, the MID index is obtained. Add the field 'flood_bridge_type' to SFMR, software can separate between 802.1q FIDs and vFIDs using two types which are supported. Signed-off-by: -
Amit Cohen authored
SFD register configures FDB table. As preparation for unified bridge model, add some required fields for future use. In the new model, firmware no longer configures the egress VID, this responsibility is moved to software. For layer 2 this means that software needs to determine the egress VID for both unicast and multicast. For unicast FDB records and unicast LAG FDB records, the VID needs to be set via new fields in SFD - 'set_vid' and 'vid'. Add the two mentioned fields for future use. Signed-off-by:
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