kernel.git/kernel/bpf, branch linux-rolling-stable

bpf: drop kthread_exit from noreturn_deny

2026-03-19T15:15:33Z

commit 7fe44c4388146bdbb3c5932d81a26d9fa0fd3ec9 upstream. kthread_exit became a macro to do_exit in commit 28aaa9c39945 ("kthread: consolidate kthread exit paths to prevent use-after-free"), so there is no kthread_exit function BTF ID to resolve. Remove it from noreturn_deny to avoid resolve_btfids unresolved symbol warnings. Signed-off-by: Christian Loehle Signed-off-by: Linus Torvalds Signed-off-by: Greg Kroah-Hartman

bpf: collect only live registers in linked regs

2026-03-12T11:10:01Z

[ Upstream commit 2658a1720a1944fbaeda937000ad2b3c3dfaf1bb ] Fix an inconsistency between func_states_equal() and collect_linked_regs(): - regsafe() uses check_ids() to verify that cached and current states have identical register id mapping. - func_states_equal() calls regsafe() only for registers computed as live by compute_live_registers(). - clean_live_states() is supposed to remove dead registers from cached states, but it can skip states belonging to an iterator-based loop. - collect_linked_regs() collects all registers sharing the same id, ignoring the marks computed by compute_live_registers(). Linked registers are stored in the state's jump history. - backtrack_insn() marks all linked registers for an instruction as precise whenever one of the linked registers is precise. The above might lead to a scenario: - There is an instruction I with register rY known to be dead at I. - Instruction I is reached via two paths: first A, then B. - On path A: - There is an id link between registers rX and rY. - Checkpoint C is created at I. - Linked register set {rX, rY} is saved to the jump history. - rX is marked as precise at I, causing both rX and rY to be marked precise at C. - On path B: - There is no id link between registers rX and rY, otherwise register states are sub-states of those in C. - Because rY is dead at I, check_ids() returns true. - Current state is considered equal to checkpoint C, propagate_precision() propagates spurious precision mark for register rY along the path B. - Depending on a program, this might hit verifier_bug() in the backtrack_insn(), e.g. if rY ∈ [r1..r5] and backtrack_insn() spots a function call. The reproducer program is in the next patch. This was hit by sched_ext scx_lavd scheduler code. Changes in tests: - verifier_scalar_ids.c selftests need modification to preserve some registers as live for __msg() checks. - exceptions_assert.c adjusted to match changes in the verifier log, R0 is dead after conditional instruction and thus does not get range. - precise.c adjusted to match changes in the verifier log, register r9 is dead after comparison and it's range is not important for test. Reported-by: Emil Tsalapatis Fixes: 0fb3cf6110a5 ("bpf: use register liveness information for func_states_equal") Signed-off-by: Eduard Zingerman Link: https://lore.kernel.org/r/20260306-linked-regs-and-propagate-precision-v1-1-18e859be570d@gmail.com Signed-off-by: Alexei Starovoitov Signed-off-by: Sasha Levin

bpf: Fix a UAF issue in bpf_trampoline_link_cgroup_shim

2026-03-12T11:09:53Z

[ Upstream commit 56145d237385ca0e7ca9ff7b226aaf2eb8ef368b ] The root cause of this bug is that when 'bpf_link_put' reduces the refcount of 'shim_link->link.link' to zero, the resource is considered released but may still be referenced via 'tr->progs_hlist' in 'cgroup_shim_find'. The actual cleanup of 'tr->progs_hlist' in 'bpf_shim_tramp_link_release' is deferred. During this window, another process can cause a use-after-free via 'bpf_trampoline_link_cgroup_shim'. Based on Martin KaFai Lau's suggestions, I have created a simple patch. To fix this: Add an atomic non-zero check in 'bpf_trampoline_link_cgroup_shim'. Only increment the refcount if it is not already zero. Testing: I verified the fix by adding a delay in 'bpf_shim_tramp_link_release' to make the bug easier to trigger: static void bpf_shim_tramp_link_release(struct bpf_link *link) { /* ... */ if (!shim_link->trampoline) return; + msleep(100); WARN_ON_ONCE(bpf_trampoline_unlink_prog(&shim_link->link, shim_link->trampoline, NULL)); bpf_trampoline_put(shim_link->trampoline); } Before the patch, running a PoC easily reproduced the crash(almost 100%) with a call trace similar to KaiyanM's report. After the patch, the bug no longer occurs even after millions of iterations. Fixes: 69fd337a975c ("bpf: per-cgroup lsm flavor") Reported-by: Kaiyan Mei Closes: https://lore.kernel.org/bpf/3c4ebb0b.46ff8.19abab8abe2.Coremail.kaiyanm@hust.edu.cn/ Signed-off-by: Lang Xu Signed-off-by: Martin KaFai Lau Link: https://patch.msgid.link/279EEE1BA1DDB49D+20260303095217.34436-1-xulang@uniontech.com Signed-off-by: Sasha Levin

bpf: Improve bounds when tnum has a single possible value

2026-03-12T11:09:25Z

[ Upstream commit efc11a667878a1d655ff034a93a539debbfedb12 ] We're hitting an invariant violation in Cilium that sometimes leads to BPF programs being rejected and Cilium failing to start [1]. The following extract from verifier logs shows what's happening: from 201 to 236: R1=0 R6=ctx() R7=1 R9=scalar(smin=umin=smin32=umin32=3584,smax=umax=smax32=umax32=3840,var_off=(0xe00; 0x100)) R10=fp0 236: R1=0 R6=ctx() R7=1 R9=scalar(smin=umin=smin32=umin32=3584,smax=umax=smax32=umax32=3840,var_off=(0xe00; 0x100)) R10=fp0 ; if (magic == MARK_MAGIC_HOST || magic == MARK_MAGIC_OVERLAY || magic == MARK_MAGIC_ENCRYPT) @ bpf_host.c:1337 236: (16) if w9 == 0xe00 goto pc+45 ; R9=scalar(smin=umin=smin32=umin32=3585,smax=umax=smax32=umax32=3840,var_off=(0xe00; 0x100)) 237: (16) if w9 == 0xf00 goto pc+1 verifier bug: REG INVARIANTS VIOLATION (false_reg1): range bounds violation u64=[0xe01, 0xe00] s64=[0xe01, 0xe00] u32=[0xe01, 0xe00] s32=[0xe01, 0xe00] var_off=(0xe00, 0x0) We reach instruction 236 with two possible values for R9, 0xe00 and 0xf00. This is perfectly reflected in the tnum, but of course the ranges are less accurate and cover [0xe00; 0xf00]. Taking the fallthrough path at instruction 236 allows the verifier to reduce the range to [0xe01; 0xf00]. The tnum is however not updated. With these ranges, at instruction 237, the verifier is not able to deduce that R9 is always equal to 0xf00. Hence the fallthrough pass is explored first, the verifier refines the bounds using the assumption that R9 != 0xf00, and ends up with an invariant violation. This pattern of impossible branch + bounds refinement is common to all invariant violations seen so far. The long-term solution is likely to rely on the refinement + invariant violation check to detect dead branches, as started by Eduard. To fix the current issue, we need something with less refactoring that we can backport. This patch uses the tnum_step helper introduced in the previous patch to detect the above situation. In particular, three cases are now detected in the bounds refinement: 1. The u64 range and the tnum only overlap in umin. u64: ---[xxxxxx]----- tnum: --xx----------x- 2. The u64 range and the tnum only overlap in the maximum value represented by the tnum, called tmax. u64: ---[xxxxxx]----- tnum: xx-----x-------- 3. The u64 range and the tnum only overlap in between umin (excluded) and umax. u64: ---[xxxxxx]----- tnum: xx----x-------x- To detect these three cases, we call tnum_step(tnum, umin), which returns the smallest member of the tnum greater than umin, called tnum_next here. We're in case (1) if umin is part of the tnum and tnum_next is greater than umax. We're in case (2) if umin is not part of the tnum and tnum_next is equal to tmax. Finally, we're in case (3) if umin is not part of the tnum, tnum_next is inferior or equal to umax, and calling tnum_step a second time gives us a value past umax. This change implements these three cases. With it, the above bytecode looks as follows: 0: (85) call bpf_get_prandom_u32#7 ; R0=scalar() 1: (47) r0 |= 3584 ; R0=scalar(smin=0x8000000000000e00,umin=umin32=3584,smin32=0x80000e00,var_off=(0xe00; 0xfffffffffffff1ff)) 2: (57) r0 &= 3840 ; R0=scalar(smin=umin=smin32=umin32=3584,smax=umax=smax32=umax32=3840,var_off=(0xe00; 0x100)) 3: (15) if r0 == 0xe00 goto pc+2 ; R0=3840 4: (15) if r0 == 0xf00 goto pc+1 4: R0=3840 6: (95) exit In addition to the new selftests, this change was also verified with Agni [3]. For the record, the raw SMT is available at [4]. The property it verifies is that: If a concrete value x is contained in all input abstract values, after __update_reg_bounds, it will continue to be contained in all output abstract values. Link: https://github.com/cilium/cilium/issues/44216 [1] Link: https://pchaigno.github.io/test-verifier-complexity.html [2] Link: https://github.com/bpfverif/agni [3] Link: https://pastebin.com/raw/naCfaqNx [4] Fixes: 0df1a55afa83 ("bpf: Warn on internal verifier errors") Acked-by: Eduard Zingerman Tested-by: Marco Schirrmeister Co-developed-by: Harishankar Vishwanathan Signed-off-by: Harishankar Vishwanathan Signed-off-by: Paul Chaignon Link: https://lore.kernel.org/r/ef254c4f68be19bd393d450188946821c588565d.1772225741.git.paul.chaignon@gmail.com Signed-off-by: Alexei Starovoitov Signed-off-by: Sasha Levin

bpf: Introduce tnum_step to step through tnum's members

2026-03-12T11:09:25Z

[ Upstream commit 76e954155b45294c502e3d3a9e15757c858ca55e ] This commit introduces tnum_step(), a function that, when given t, and a number z returns the smallest member of t larger than z. The number z must be greater or equal to the smallest member of t and less than the largest member of t. The first step is to compute j, a number that keeps all of t's known bits, and matches all unknown bits to z's bits. Since j is a member of the t, it is already a candidate for result. However, we want our result to be (minimally) greater than z. There are only two possible cases: (1) Case j <= z. In this case, we want to increase the value of j and make it > z. (2) Case j > z. In this case, we want to decrease the value of j while keeping it > z. (Case 1) j <= z t = xx11x0x0 z = 10111101 (189) j = 10111000 (184) ^ k (Case 1.1) Let's first consider the case where j < z. We will address j == z later. Since z > j, there had to be a bit position that was 1 in z and a 0 in j, beyond which all positions of higher significance are equal in j and z. Further, this position could not have been unknown in a, because the unknown positions of a match z. This position had to be a 1 in z and known 0 in t. Let k be position of the most significant 1-to-0 flip. In our example, k = 3 (starting the count at 1 at the least significant bit). Setting (to 1) the unknown bits of t in positions of significance smaller than k will not produce a result > z. Hence, we must set/unset the unknown bits at positions of significance higher than k. Specifically, we look for the next larger combination of 1s and 0s to place in those positions, relative to the combination that exists in z. We can achieve this by concatenating bits at unknown positions of t into an integer, adding 1, and writing the bits of that result back into the corresponding bit positions previously extracted from z. >From our example, considering only positions of significance greater than k: t = xx..x z = 10..1 + 1 ----- 11..0 This is the exact combination 1s and 0s we need at the unknown bits of t in positions of significance greater than k. Further, our result must only increase the value minimally above z. Hence, unknown bits in positions of significance smaller than k should remain 0. We finally have, result = 11110000 (240) (Case 1.2) Now consider the case when j = z, for example t = 1x1x0xxx z = 10110100 (180) j = 10110100 (180) Matching the unknown bits of the t to the bits of z yielded exactly z. To produce a number greater than z, we must set/unset the unknown bits in t, and *all* the unknown bits of t candidates for being set/unset. We can do this similar to Case 1.1, by adding 1 to the bits extracted from the masked bit positions of z. Essentially, this case is equivalent to Case 1.1, with k = 0. t = 1x1x0xxx z = .0.1.100 + 1 --------- .0.1.101 This is the exact combination of bits needed in the unknown positions of t. After recalling the known positions of t, we get result = 10110101 (181) (Case 2) j > z t = x00010x1 z = 10000010 (130) j = 10001011 (139) ^ k Since j > z, there had to be a bit position which was 0 in z, and a 1 in j, beyond which all positions of higher significance are equal in j and z. This position had to be a 0 in z and known 1 in t. Let k be the position of the most significant 0-to-1 flip. In our example, k = 4. Because of the 0-to-1 flip at position k, a member of t can become greater than z if the bits in positions greater than k are themselves >= to z. To make that member *minimally* greater than z, the bits in positions greater than k must be exactly = z. Hence, we simply match all of t's unknown bits in positions more significant than k to z's bits. In positions less significant than k, we set all t's unknown bits to 0 to retain minimality. In our example, in positions of greater significance than k (=4), t=x000. These positions are matched with z (1000) to produce 1000. In positions of lower significance than k, t=10x1. All unknown bits are set to 0 to produce 1001. The final result is: result = 10001001 (137) This concludes the computation for a result > z that is a member of t. The procedure for tnum_step() in this commit implements the idea described above. As a proof of correctness, we verified the algorithm against a logical specification of tnum_step. The specification asserts the following about the inputs t, z and output res that: 1. res is a member of t, and 2. res is strictly greater than z, and 3. there does not exist another value res2 such that 3a. res2 is also a member of t, and 3b. res2 is greater than z 3c. res2 is smaller than res We checked the implementation against this logical specification using an SMT solver. The verification formula in SMTLIB format is available at [1]. The verification returned an "unsat": indicating that no input assignment exists for which the implementation and the specification produce different outputs. In addition, we also automatically generated the logical encoding of the C implementation using Agni [2] and verified it against the same specification. This verification also returned an "unsat", confirming that the implementation is equivalent to the specification. The formula for this check is also available at [3]. Link: https://pastebin.com/raw/2eRWbiit [1] Link: https://github.com/bpfverif/agni [2] Link: https://pastebin.com/raw/EztVbBJ2 [3] Co-developed-by: Srinivas Narayana Signed-off-by: Srinivas Narayana Co-developed-by: Santosh Nagarakatte Signed-off-by: Santosh Nagarakatte Signed-off-by: Harishankar Vishwanathan Link: https://lore.kernel.org/r/93fdf71910411c0f19e282ba6d03b4c65f9c5d73.1772225741.git.paul.chaignon@gmail.com Signed-off-by: Alexei Starovoitov Stable-dep-of: efc11a667878 ("bpf: Improve bounds when tnum has a single possible value") Signed-off-by: Sasha Levin

bpf: Add bitwise tracking for BPF_END

2026-03-12T11:09:25Z

[ Upstream commit 9d21199842247ab05c675fb9b6c6ca393a5c0024 ] This patch implements bitwise tracking (tnum analysis) for BPF_END (byte swap) operation. Currently, the BPF verifier does not track value for BPF_END operation, treating the result as completely unknown. This limits the verifier's ability to prove safety of programs that perform endianness conversions, which are common in networking code. For example, the following code pattern for port number validation: int test(struct pt_regs *ctx) { __u64 x = bpf_get_prandom_u32(); x &= 0x3f00; // Range: [0, 0x3f00], var_off: (0x0; 0x3f00) x = bswap16(x); // Should swap to range [0, 0x3f], var_off: (0x0; 0x3f) if (x > 0x3f) goto trap; return 0; trap: return *(u64 *)NULL; // Should be unreachable } Currently generates verifier output: 1: (54) w0 &= 16128 ; R0=scalar(smin=smin32=0,smax=umax=smax32=umax32=16128,var_off=(0x0; 0x3f00)) 2: (d7) r0 = bswap16 r0 ; R0=scalar() 3: (25) if r0 > 0x3f goto pc+2 ; R0=scalar(smin=smin32=0,smax=umax=smax32=umax32=63,var_off=(0x0; 0x3f)) Without this patch, even though the verifier knows `x` has certain bits set, after bswap16, it loses all tracking information and treats port as having a completely unknown value [0, 65535]. According to the BPF instruction set[1], there are 3 kinds of BPF_END: 1. `bswap(16|32|64)`: opcode=0xd7 (BPF_END | BPF_ALU64 | BPF_TO_LE) - do unconditional swap 2. `le(16|32|64)`: opcode=0xd4 (BPF_END | BPF_ALU | BPF_TO_LE) - on big-endian: do swap - on little-endian: truncation (16/32-bit) or no-op (64-bit) 3. `be(16|32|64)`: opcode=0xdc (BPF_END | BPF_ALU | BPF_TO_BE) - on little-endian: do swap - on big-endian: truncation (16/32-bit) or no-op (64-bit) Since BPF_END operations are inherently bit-wise permutations, tnum (bitwise tracking) offers the most efficient and precise mechanism for value analysis. By implementing `tnum_bswap16`, `tnum_bswap32`, and `tnum_bswap64`, we can derive exact `var_off` values concisely, directly reflecting the bit-level changes. Here is the overview of changes: 1. In `tnum_bswap(16|32|64)` (kernel/bpf/tnum.c): Call `swab(16|32|64)` function on the value and mask of `var_off`, and do truncation for 16/32-bit cases. 2. In `adjust_scalar_min_max_vals` (kernel/bpf/verifier.c): Call helper function `scalar_byte_swap`. - Only do byte swap when * alu64 (unconditional swap) OR * switching between big-endian and little-endian machines. - If need do byte swap: * Firstly call `tnum_bswap(16|32|64)` to update `var_off`. * Then reset the bound since byte swap scrambles the range. - For 16/32-bit cases, truncate dst register to match the swapped size. This enables better verification of networking code that frequently uses byte swaps for protocol processing, reducing false positive rejections. [1] https://www.kernel.org/doc/Documentation/bpf/standardization/instruction-set.rst Co-developed-by: Shenghao Yuan Signed-off-by: Shenghao Yuan Co-developed-by: Yazhou Tang Signed-off-by: Yazhou Tang Signed-off-by: Tianci Cao Acked-by: Eduard Zingerman Link: https://lore.kernel.org/r/20260204111503.77871-2-ziye@zju.edu.cn Signed-off-by: Alexei Starovoitov Stable-dep-of: efc11a667878 ("bpf: Improve bounds when tnum has a single possible value") Signed-off-by: Sasha Levin

bpf: Fix race in devmap on PREEMPT_RT

2026-03-12T11:09:25Z

[ Upstream commit 1872e75375c40add4a35990de3be77b5741c252c ] On PREEMPT_RT kernels, the per-CPU xdp_dev_bulk_queue (bq) can be accessed concurrently by multiple preemptible tasks on the same CPU. The original code assumes bq_enqueue() and __dev_flush() run atomically with respect to each other on the same CPU, relying on local_bh_disable() to prevent preemption. However, on PREEMPT_RT, local_bh_disable() only calls migrate_disable() (when PREEMPT_RT_NEEDS_BH_LOCK is not set) and does not disable preemption, which allows CFS scheduling to preempt a task during bq_xmit_all(), enabling another task on the same CPU to enter bq_enqueue() and operate on the same per-CPU bq concurrently. This leads to several races: 1. Double-free / use-after-free on bq->q[]: bq_xmit_all() snapshots cnt = bq->count, then iterates bq->q[0..cnt-1] to transmit frames. If preempted after the snapshot, a second task can call bq_enqueue() -> bq_xmit_all() on the same bq, transmitting (and freeing) the same frames. When the first task resumes, it operates on stale pointers in bq->q[], causing use-after-free. 2. bq->count and bq->q[] corruption: concurrent bq_enqueue() modifying bq->count and bq->q[] while bq_xmit_all() is reading them. 3. dev_rx/xdp_prog teardown race: __dev_flush() clears bq->dev_rx and bq->xdp_prog after bq_xmit_all(). If preempted between bq_xmit_all() return and bq->dev_rx = NULL, a preempting bq_enqueue() sees dev_rx still set (non-NULL), skips adding bq to the flush_list, and enqueues a frame. When __dev_flush() resumes, it clears dev_rx and removes bq from the flush_list, orphaning the newly enqueued frame. 4. __list_del_clearprev() on flush_node: similar to the cpumap race, both tasks can call __list_del_clearprev() on the same flush_node, the second dereferences the prev pointer already set to NULL. The race between task A (__dev_flush -> bq_xmit_all) and task B (bq_enqueue -> bq_xmit_all) on the same CPU: Task A (xdp_do_flush) Task B (ndo_xdp_xmit redirect) ---------------------- -------------------------------- __dev_flush(flush_list) bq_xmit_all(bq) cnt = bq->count /* e.g. 16 */ /* start iterating bq->q[] */ <-- CFS preempts Task A --> bq_enqueue(dev, xdpf) bq->count == DEV_MAP_BULK_SIZE bq_xmit_all(bq, 0) cnt = bq->count /* same 16! */ ndo_xdp_xmit(bq->q[]) /* frames freed by driver */ bq->count = 0 <-- Task A resumes --> ndo_xdp_xmit(bq->q[]) /* use-after-free: frames already freed! */ Fix this by adding a local_lock_t to xdp_dev_bulk_queue and acquiring it in bq_enqueue() and __dev_flush(). These paths already run under local_bh_disable(), so use local_lock_nested_bh() which on non-RT is a pure annotation with no overhead, and on PREEMPT_RT provides a per-CPU sleeping lock that serializes access to the bq. Fixes: 3253cb49cbad ("softirq: Allow to drop the softirq-BKL lock on PREEMPT_RT") Reported-by: Sebastian Andrzej Siewior Reviewed-by: Sebastian Andrzej Siewior Signed-off-by: Jiayuan Chen Signed-off-by: Jiayuan Chen Link: https://lore.kernel.org/r/20260225121459.183121-3-jiayuan.chen@linux.dev Signed-off-by: Alexei Starovoitov Signed-off-by: Sasha Levin

bpf: Fix race in cpumap on PREEMPT_RT

2026-03-12T11:09:25Z

[ Upstream commit 869c63d5975d55e97f6b168e885452b3da20ea47 ] On PREEMPT_RT kernels, the per-CPU xdp_bulk_queue (bq) can be accessed concurrently by multiple preemptible tasks on the same CPU. The original code assumes bq_enqueue() and __cpu_map_flush() run atomically with respect to each other on the same CPU, relying on local_bh_disable() to prevent preemption. However, on PREEMPT_RT, local_bh_disable() only calls migrate_disable() (when PREEMPT_RT_NEEDS_BH_LOCK is not set) and does not disable preemption, which allows CFS scheduling to preempt a task during bq_flush_to_queue(), enabling another task on the same CPU to enter bq_enqueue() and operate on the same per-CPU bq concurrently. This leads to several races: 1. Double __list_del_clearprev(): after bq->count is reset in bq_flush_to_queue(), a preempting task can call bq_enqueue() -> bq_flush_to_queue() on the same bq when bq->count reaches CPU_MAP_BULK_SIZE. Both tasks then call __list_del_clearprev() on the same bq->flush_node, the second call dereferences the prev pointer that was already set to NULL by the first. 2. bq->count and bq->q[] races: concurrent bq_enqueue() can corrupt the packet queue while bq_flush_to_queue() is processing it. The race between task A (__cpu_map_flush -> bq_flush_to_queue) and task B (bq_enqueue -> bq_flush_to_queue) on the same CPU: Task A (xdp_do_flush) Task B (cpu_map_enqueue) ---------------------- ------------------------ bq_flush_to_queue(bq) spin_lock(&q->producer_lock) /* flush bq->q[] to ptr_ring */ bq->count = 0 spin_unlock(&q->producer_lock) bq_enqueue(rcpu, xdpf) <-- CFS preempts Task A --> bq->q[bq->count++] = xdpf /* ... more enqueues until full ... */ bq_flush_to_queue(bq) spin_lock(&q->producer_lock) /* flush to ptr_ring */ spin_unlock(&q->producer_lock) __list_del_clearprev(flush_node) /* sets flush_node.prev = NULL */ <-- Task A resumes --> __list_del_clearprev(flush_node) flush_node.prev->next = ... /* prev is NULL -> kernel oops */ Fix this by adding a local_lock_t to xdp_bulk_queue and acquiring it in bq_enqueue() and __cpu_map_flush(). These paths already run under local_bh_disable(), so use local_lock_nested_bh() which on non-RT is a pure annotation with no overhead, and on PREEMPT_RT provides a per-CPU sleeping lock that serializes access to the bq. To reproduce, insert an mdelay(100) between bq->count = 0 and __list_del_clearprev() in bq_flush_to_queue(), then run reproducer provided by syzkaller. Fixes: 3253cb49cbad ("softirq: Allow to drop the softirq-BKL lock on PREEMPT_RT") Reported-by: syzbot+2b3391f44313b3983e91@syzkaller.appspotmail.com Closes: https://lore.kernel.org/all/69369331.a70a0220.38f243.009d.GAE@google.com/T/ Reviewed-by: Sebastian Andrzej Siewior Signed-off-by: Jiayuan Chen Signed-off-by: Jiayuan Chen Link: https://lore.kernel.org/r/20260225121459.183121-2-jiayuan.chen@linux.dev Signed-off-by: Alexei Starovoitov Signed-off-by: Sasha Levin

bpf: Fix stack-out-of-bounds write in devmap

2026-03-12T11:09:24Z

[ Upstream commit b7bf516c3ecd9a2aae2dc2635178ab87b734fef1 ] get_upper_ifindexes() iterates over all upper devices and writes their indices into an array without checking bounds. Also the callers assume that the max number of upper devices is MAX_NEST_DEV and allocate excluded_devices[1+MAX_NEST_DEV] on the stack, but that assumption is not correct and the number of upper devices could be larger than MAX_NEST_DEV (e.g., many macvlans), causing a stack-out-of-bounds write. Add a max parameter to get_upper_ifindexes() to avoid the issue. When there are too many upper devices, return -EOVERFLOW and abort the redirect. To reproduce, create more than MAX_NEST_DEV(8) macvlans on a device with an XDP program attached using BPF_F_BROADCAST | BPF_F_EXCLUDE_INGRESS. Then send a packet to the device to trigger the XDP redirect path. Reported-by: syzbot+10cc7f13760b31bd2e61@syzkaller.appspotmail.com Closes: https://lore.kernel.org/all/698c4ce3.050a0220.340abe.000b.GAE@google.com/T/ Fixes: aeea1b86f936 ("bpf, devmap: Exclude XDP broadcast to master device") Reviewed-by: Toke Høiland-Jørgensen Signed-off-by: Kohei Enju Link: https://lore.kernel.org/r/20260225053506.4738-1-kohei@enjuk.jp Signed-off-by: Alexei Starovoitov Signed-off-by: Sasha Levin

bpf: Properly mark live registers for indirect jumps

2026-03-04T12:19:44Z

[ Upstream commit d1aab1ca576c90192ba961094d51b0be6355a4d6 ] For a `gotox rX` instruction the rX register should be marked as used in the compute_insn_live_regs() function. Fix this. Signed-off-by: Anton Protopopov Link: https://lore.kernel.org/r/20260114162544.83253-2-a.s.protopopov@gmail.com Signed-off-by: Alexei Starovoitov Signed-off-by: Sasha Levin