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| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-72482 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: gpib: fix double decrement of descriptor_busy in command_ioctl() commit d1857f8296dc ("gpib: fix use-after-free in IO ioctl handlers") introduced a descriptor_busy reference counter to pin struct gpib_descriptor across IO ioctl operations. In command_ioctl(), the error path inside the loop decrements descriptor_busy and breaks, but execution then falls through to the unconditional decrement after the loop, underflowing the counter to -1. This re-enables the use-after-free that the original fix was meant to prevent: a concurrent close_dev_ioctl() sees descriptor_busy == 0 on an actively-used descriptor and frees it. Remove the early decrement from the error path. The post-loop decrement already handles all exit paths, matching the correct pattern used in read_ioctl() and write_ioctl(). | ||||
| CVE-2026-74576 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 7.5 High |
| In the Linux kernel, the following vulnerability has been resolved: mm/slab: prevent unbounded recursion in free path with new kmalloc type Commit 280ea9c3154b ("mm/slab: avoid allocating slabobj_ext array from its own slab") avoided recursive allocation of obj_exts from kmalloc caches of the same size, by bumping the obj_exts array's allocation size whenever the array size equals the size of the object being allocated. However, as reported by Danielle Costantino and Shakeel Butt, even slabs from kmalloc caches of different sizes can form a cycle by allocating obj_exts arrays from each other [1]: What happened: a KMALLOC_NORMAL slab's obj_exts array (used by allocation profiling / memcg accounting) is itself kmalloc()'d from a KMALLOC_NORMAL cache, so the "slab holds another slab's obj_exts array" relation can form cycles. With sizeof(struct slabobj_ext) == 16 and the host's geometry: - kmalloc-512 has 64 objects/slab -> array is 64*16 == 1024 bytes, served from kmalloc-1k; - kmalloc-1k has 32 objects/slab -> array is 32*16 == 512 bytes, served from kmalloc-512. A kmalloc-512 slab and a kmalloc-1k slab therefore hold each other's obj_exts array. Discarding one frees the other's array, which empties and discards that slab, which frees the first's array, and so on: __free_slab() -> free_slab_obj_exts() -> kfree() -> discard_slab() -> __free_slab() recurses along the cycle until the stack is exhausted. With memory allocation profiling, this allows unbounded recursion in the free path and led to a stack overflow on a production host in the Meta fleet [1]: BUG: TASK stack guard page was hit Oops: stack guard page RIP: 0010:kfree+0x8/0x5d0 Call Trace: __free_slab+0x66/0xc0 kfree+0x3f0/0x5d0 ... ( ~125x __free_slab <-> kfree ) ... <kernel driver freeing a resource> do_syscall_64 It is proposed [1] to resolve this issue by always serving the obj_exts array allocation from kmalloc caches (or large kmalloc) of sizes larger than the object size. However, as pointed out by Vlastimil Babka [2], this can waste an excessive amount of memory as slabs from large kmalloc sizes (e.g. kmalloc-8k) generally need obj_exts arrays much smaller than the object size. Therefore, rather than bumping the size, let us take a different approach; disallow formation of cycles between kmalloc types when allocating obj_exts arrays. Currently, all obj_exts arrays are served from normal kmalloc caches. Cycles cannot be created if obj_exts arrays of normal kmalloc caches are served from a special kmalloc type that can never have obj_exts arrays. To achieve this, create a new kmalloc type called KMALLOC_NO_OBJ_EXT. KMALLOC_NO_OBJ_EXT caches are created with SLAB_NO_OBJ_EXT flag when either 1) memory allocation profiling is not permanently disabled, or 2) kmalloc types with a priority higher than KMALLOC_CGROUP are aliased with KMALLOC_NORMAL. Sheaf bootstrapping for KMALLOC_NO_OBJ_EXT caches now must be deferred because allocation of a barn can trigger obj_exts array allocation of normal kmalloc caches when the KMALLOC_NO_OBJ_EXT cache for that size is not ready yet. For simplicity, perform bootstrapping of sheaves for all kmalloc caches later. Introduce a new slab alloc flag, SLAB_ALLOC_NO_OBJ_EXT, to prevent allocation of obj_exts arrays, and let kmalloc_slab() override the type to KMALLOC_NO_OBJ_EXT when specified. Note that kmalloc_type() remains unchanged because kmalloc_flags() bypasses the kmalloc fastpath. Do not pass SLAB_ALLOC_NO_RECURSE to kmalloc_flags() in alloc_slab_obj_exts() and instead use SLAB_ALLOC_NO_OBJ_EXT only when the objects are allocated from normal kmalloc caches. While this prevents unbounded recursive allocation of obj_exts, it allows KMALLOC_NO_OBJ_EXT caches to have sheaves. Since sheaf allocations specify SLAB_ALLOC_NO_RECURSE that prevents allocation of both sheaves and obj_exts arrays, the recursion depth is bounded. obj_exts arrays for non- ---truncated--- | ||||
| CVE-2026-74272 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: cxl/region: Resolve region deletion races Sungwoo noticed that the sysfs trigger to delete a region may try to delete a region multiple times. It also has no exclusion relative to the kernel releasing the region via CXL root device teardown. Instead of installing new cxl root devres actions per region, use the existing root decoder unregistration event to remove all remaining regions. An xarray of regions replaces a devres list of regions. This handles 3 separate issues with the old approach: 1/ sysfs users racing to delete the same region: no longer possible now that the regions_lock is held over the lookup and deletion. 2/ multiple actions triggering deletion of the same region: solved by erasing regions while holding @regions_lock, and only proceeding on successful erasure. 3/ userspace racing devres_release_all() to trigger the devres not found warning: solved by sysfs unregistration not requiring a release action | ||||
| CVE-2026-74463 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: i2c: jz4780: Cache host clock rate at probe to prevent CCF prepare_lock deadlock Fix a severe AB/BA deadlock between the Common Clock Framework (CCF) and the I2C adapter lock, which triggers when an I2C-controlled clock generator client (like the Si5351) is registered or modified under the CCF. During an i2c client clock (generator) frequency change, the CCF acquires its global 'prepare_lock' mutex and the driver calls i2c_transfer() to update the client's chip registers, stalling for the adapter's I2C bus lock. Concurrently, an independent, parallel transfer on the same bus (e.g., a GPIO expander handling LEDs) can hold the I2C adapter lock. Inside this parallel transfer path, jz4780_i2c_set_speed() calls clk_get_rate() on the host controller's input clock to calculate bus timings. This call attempts to acquire the blocked CCF 'prepare_lock', creating a circular dependency that freezes the system. The jz4780 host controller clock itself is static and never changes at runtime. However, calling clk_get_rate() inside the active transfer path introduces an unnecessary dependency on the CCF internal locks. Eliminate this synchronous clk_get_rate() call from the active transfer path by caching the static host peripheral clock rate once - inside the private jz4780_i2c structure during jz4780_i2c_probe(). Update jz4780_i2c_set_speed() to use this cached value, safely decoupling active I2C transactions from the CCF internal locks without any risk of stale timings. Assisted-by web based Google AI (pinpointing the bug and writing the message). | ||||
| CVE-2026-74518 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: mm/hugetlb: fix list corruption in allocate_file_region_entries() allocate_file_region_entries() tops up resv->region_cache with freshly allocated file_region descriptors. The allocation uses GFP_KERNEL, so resv->lock is dropped around it: the new entries are gathered on a stack-local list head, allocated_regions, and spliced into resv->region_cache once the lock is re-acquired. The splice used list_splice(), which moves the entries but does not re-initialize the source head, so allocated_regions is left pointing at an entry that now lives on resv->region_cache. The top-up runs in a while loop that re-checks the cache deficit after re-acquiring the lock. For a shared mapping the resv_map is shared by every mapper of the hugetlbfs inode, so a concurrent region_chg()/region_add()/region_del() on the same resv_map can consume cache entries during the unlocked window and force a second iteration. That iteration calls list_add() on the stale head and corrupts the list; with CONFIG_DEBUG_LIST the __list_add_valid() check trips: list_add corruption. next->prev should be prev (ffffc900011ff7f8), but was ffff88814c281460. (next=ffff88814c545640). kernel BUG at lib/list_debug.c:31! allocate_file_region_entries+0x191/0x420 region_chg+0x267/0x300 hugetlb_reserve_pages+0x387/0xc80 hugetlbfs_file_mmap+0x2ce/0x3f0 mmap_region+0x1348/0x1a80 do_mmap+0x85e/0xb90 vm_mmap_pgoff+0x18c/0x330 ksys_mmap_pgoff+0x2a1/0x3e0 do_syscall_64+0xd7/0x420 Without CONFIG_DEBUG_LIST the bad list_add() silently links a kernel-stack address into resv->region_cache, leading to later use-after-free. This was observed as a real host panic on a dense KVM host where a QEMU guest-RAM hugetlbfs file was mapped MAP_SHARED by both QEMU and a separate SPDK/DPDK vhost-user target, generating concurrent region_* traffic on one shared resv_map. Use list_splice_init() so the source head is re-initialized empty after each splice, making the retry loop safe. | ||||
| CVE-2026-74524 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: riscv: mm: Fix out-of-bounds page-table walk during memory hot-remove remove_pud_mapping() and remove_p4d_mapping() obtain a child table base with pud_offset(p4dp, 0) and p4d_offset(pgd, 0), then add the index for addr. RISC-V folds page-table levels at runtime. When a level is folded, its offset helper returns the parent entry itself, but the index can still be nonzero. Adding it walks past the parent table. Sv48 folds P4D, while Sv39 folds both P4D and PUD, so memory hot-remove can descend into unrelated memory and pass an invalid page to __free_pages(). This can trigger: kernel BUG at include/linux/mm.h:1810! VM_BUG_ON_PAGE(page_ref_count(page) == 0) arch_remove_memory+0x1e/0x5c try_remove_memory+0x15e/0x200 remove_memory+0x24/0x3c Only add the index when the corresponding page-table level is enabled, matching p4d_offset() and pud_offset(). | ||||
| CVE-2026-74457 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: can: peak_usb: add bounds check for USB channel index The channel control index ctrl_idx is derived from rx->len which comes directly from a device USB payload. The mask 0x0f allows values 0-15, but the array size of usb_if->dev[] is only 2. Values 2-15 cause heap out-of-bounds read, eventually causing kernel panic in the IRQ context. Add bounds checking for ctrl_idx before the array access in both pcan_usb_pro_handle_canmsg() and pcan_usb_pro_handle_error(). | ||||
| CVE-2026-74534 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: Bluetooth: ISO: fix refcounting of iso_conn iso_conn_del() and iso_chan_del() have a race that results to double-put of iso_conn: [Task hdev->workqueue] [Task 2] iso_conn_del iso_chan_del iso_conn_hold_unless_zero iso_conn_lock iso_conn_lock conn->sk = NULL iso_conn_unlock sk = iso_sock_hold(conn) <---------´ if (!sk) iso_conn_put iso_conn_put iso_conn_put /* UAF */ The extra put for !sk in iso_conn_del() is currently required since failing iso_chan_add() may leave iso_conn not associated with any sk. Fix by having iso_pi(sk)->conn own refcount when non-NULL, so iso_conn_del does not need to put it. Adjust the iso_conn_add() refcounting so that conn is put if it does not get associated with an sk. | ||||
| CVE-2026-72495 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 9.3 Critical |
| In the Linux kernel, the following vulnerability has been resolved: RDMA/bnxt_re: Avoid repeated requests to allocate WC pages Applications can request multiple WC pages for the same ucontext. As of now, only 1 WC page per ucontext is supported. Add a lock to avoid concurrent access and a check to fail repeated requests. Also, if the mmap entry insert fails for the WC, free the Doorbell page index mapped for the WC page. | ||||
| CVE-2026-72500 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: RDMA/bnxt_re: Free SRQ toggle page after firmware teardown Free the toggle page only after firmware teardown completes so that an NQ interrupt arriving during bnxt_qplib_destroy_srq() won't write the toggle values to an already-freed page. Move free_page() after bnxt_qplib_destroy_srq(). | ||||
| CVE-2026-74261 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: ALSA: seq: avoid stale FIFO cells during resize snd_seq_fifo_resize() still needs to publish the replacement pool before it waits for FIFO users. A blocking snd_seq_read() holds f->use_lock while it sleeps, so concurrent senders must be able to queue to the new pool and wake that reader instead of failing against a closing old pool. However, snd_seq_fifo_event_in() duplicates an event before it takes f->lock, and snd_seq_read() can dequeue a cell and later call snd_seq_fifo_cell_putback() if copy_to_user() or snd_seq_expand_var_event() fails. If resize swaps f->pool and detaches oldhead in between, either path can relink an old-pool cell after the snapshot. That stale cell sits outside the drained oldhead list, keeps oldpool->counter elevated, and can leave snd_seq_pool_delete() waiting for the retired pool to drain. Keep the existing swap-before-wait ordering in snd_seq_fifo_resize(), but reject stale cells before any FIFO relink. Revalidate event-in cells under f->lock and retry them against the published replacement pool, and free stale putback cells instead of linking them back into the FIFO. The buggy scenario involves two paths, with each column showing the order within that path: resize path: relink path: 1. Allocate newpool. 1. Take f->use_lock. 2. Swap f->pool to newpool and 2. Duplicate or dequeue an old-pool detach oldhead. cell before oldpool closes. 3. Mark oldpool closing and 3. Reach a later relink point after wait for FIFO users. resize published newpool. 4. Free oldhead and delete 4. Relink the old-pool cell after oldpool. resize detached oldhead. 5. Drop f->use_lock. The reproducer reports a resize ioctl blocked in the expected pool teardown path: signal: resize iteration=98 target_pool=4 exceeded 250ms (elapsed=251ms) diagnostic: resize_tid=651 wchan=snd_seq_pool_done diagnostic: resize_tid=651 stack= snd_seq_pool_done+0x5b/0x140 snd_seq_pool_delete+0x7a/0x90 snd_seq_fifo_resize+0x193/0x1e0 snd_seq_ioctl_set_client_pool+0x214/0x260 snd_seq_ioctl+0x119/0x540 __x64_sys_ioctl+0xd1/0x120 do_syscall_64+0xbb/0x2f0 entry_SYSCALL_64_after_hwframe+0x77/0x7f A second run with larger pools hit the same target path: signal: resize iteration=32 target_pool=64 exceeded 250ms (elapsed=251ms) diagnostic: resize_tid=663 wchan=snd_seq_pool_done diagnostic: resize_tid=663 stack= snd_seq_pool_done+0x5b/0x140 snd_seq_pool_delete+0x7a/0x90 snd_seq_fifo_resize+0x193/0x1e0 snd_seq_ioctl_set_client_pool+0x214/0x260 snd_seq_ioctl+0x119/0x540 __x64_sys_ioctl+0xd1/0x120 do_syscall_64+0xbb/0x2f0 entry_SYSCALL_64_after_hwframe+0x77/0x7f | ||||
| CVE-2026-74270 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: handshake: Require admin permission for DONE command ACCEPT and DONE are the two downcalls of the handshake genl family, both intended for use by the trusted handshake agent (tlshd). ACCEPT already requires GENL_ADMIN_PERM; DONE has no privilege check at all. The fd-lookup in handshake_nl_done_doit() only confirms that some pending handshake request exists for the supplied sockfd; it does not authenticate the sender. An unprivileged process that guesses or observes a valid sockfd can therefore submit a DONE with HANDSHAKE_A_DONE_STATUS == 0, leaving the kernel consumer to proceed as if the handshake succeeded. A non-zero status on a forged DONE tears down a legitimate in-flight handshake before tlshd can report its real result. | ||||
| CVE-2026-74540 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: Bluetooth: L2CAP: fix UAF in l2cap_le_connect_rsp l2cap_le_connect_rsp() obtains a channel via __l2cap_get_chan_by_ident() but neither holds a reference nor uses l2cap_chan_hold_unless_zero() before locking and operating on it. A concurrent l2cap_chan_del() triggered by a remote disconnect can free the channel between the lookup and l2cap_chan_lock(), causing a use-after-free. The BR/EDR counterpart l2cap_connect_rsp() and the sibling handler l2cap_le_command_rej() already use l2cap_chan_hold_unless_zero() to safely hold a reference, but l2cap_le_connect_rsp() was left unprotected. Fix by adding l2cap_chan_hold_unless_zero() after the ident lookup and l2cap_chan_put() on the exit path, consistent with other L2CAP response handlers. | ||||
| CVE-2026-74552 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: hwmon: (lm90) Only report alarms if driver is ready Userspace can read sysfs attributes before driver registration is complete, immediately after devm_hwmon_device_register_with_info() has been called. At that time, data->hwmon_dev is not yet initialized. This can trigger a NULL pointer access since lm90_update_device() and with it lm90_update_alarms_locked() will be called. This call schedules report_work and lm90_report_alarms(), which passes the still-NULL data->hwmon_dev to hwmon_notify_event() and triggers a NULL pointer dereference. Fix the problem by only scheduling the report and alert workers data->hwmon_dev is set. | ||||
| CVE-2026-74275 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 8.4 High |
| In the Linux kernel, the following vulnerability has been resolved: cxl/region: Fix out-of-bounds access in cxl_cancel_auto_attach() In cxl_cancel_auto_attach(), it assumes cxled->pos is a valid index for accessing p->targets[]. However, cxled->pos can be set to negative errno in cxl_region_sort_targets() if cxl_calc_interleave_pos() fails. This causes the driver to use a negative index to access p->targets[], resulting in out-of-bounds access. Fix it by walking p->targets[] instead of using cxled->pos directly. | ||||
| CVE-2026-74276 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: spi: xilinx: use FIFO occupancy register to determine buffer size The method the driver uses to determine the size of the FIFO has a problem. What it currently does is this: It stops the SPI hardware and writes to the TX FIFO register until TX FIFO FULL asserts in the status register. But the hardware does not only have the FIFO, it also has a shift register which can hold a byte. This can be seen, when writing a byte to the FIFO (while the SPI hardware is stopped,) the TX FIFO EMPTY is still empty. So, if we have a FIFO size of 16 for example, the current method returns a 17. This is a problem, at least when using the driver in irq mode. The same size determined for the TX FIFO is also assumed for the RX FIFO. When a SPI transaction wants to write the amount of the FIFO size or more bytes, the following happens, for example with 16 bytes FIFO size: The driver stops the SPI hardware and writes 17 bytes to the TX FIFO and starts the SPI hardware and goes sleep. The hardware then shifts out 17 bytes (FIFO + shift register) and simultaneously reads bytes into the RX FIFO, but it only has 16 places, so it looses one byte. Then TX FIFO empty asserts, wakes the driver again, which has a fast path and reads 16 bytes from the RX FIFO, but before reading the last 17th byte (which is lost) it does this: sr = xspi->read_fn(xspi->regs + XSPI_SR_OFFSET); if (!(sr & XSPI_SR_RX_EMPTY_MASK)) { xilinx_spi_rx(xspi); rx_words--; } It reads the status register and checks if the RX FIFO is not empty. But it is empty in our case. So this check spins in a while loop forever locking the driver. This patch fixes the logic to determine the FIFO size. | ||||
| CVE-2026-74280 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 10 Critical |
| In the Linux kernel, the following vulnerability has been resolved: crypto: marvell/octeontx - fix DMA cleanup using wrong loop index The sg_cleanup path used list[i] instead of list[j] when unmapping DMA buffers, leaking successfully mapped entries and repeatedly unmapping the failed one. | ||||
| CVE-2026-74281 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 7.5 High |
| In the Linux kernel, the following vulnerability has been resolved: tipc: reject inverted service ranges from peer bindings tipc_update_nametbl() inserts a binding advertised by a peer node using the lower and upper service-range bounds taken directly from the wire, without checking that lower <= upper. The local bind path validates the ordering (tipc_uaddr_valid()), but the name-distribution path does not. A binding with lower > upper is inserted at the far end of the service-range rbtree (keyed on lower) where no lookup or withdrawal can ever match it (service_range_foreach_match() requires sr->lower <= end). The publication, its service_range node and the augmented rbtree entry are then leaked for the lifetime of the namespace, and there is no per-peer cap equivalent to TIPC_MAX_PUBL on locally created bindings. Reject inverted ranges in the network path as well. A peer node can otherwise leak unbounded binding-table memory by sending PUBLICATION items with lower > upper. | ||||
| CVE-2026-74577 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: net: mpls: initialize rtm_tos in mpls_getroute() mpls_getroute() builds the RTM_NEWROUTE reply to an RTM_GETROUTE request by filling a struct rtmsg allocated from an skb whose data area is not zeroed (alloc_skb(NLMSG_GOODSIZE, ...)). It sets every field of the header except rtm_tos: r = nlmsg_data(nlh); r->rtm_family = AF_MPLS; r->rtm_dst_len = 20; r->rtm_src_len = 0; r->rtm_table = RT_TABLE_MAIN; r->rtm_type = RTN_UNICAST; r->rtm_scope = RT_SCOPE_UNIVERSE; r->rtm_protocol = rt->rt_protocol; r->rtm_flags = 0; struct rtmsg has no padding, so the one uninitialised byte rtm_tos (offset 3) is copied straight to user space on recvmsg(), leaking a byte of uninitialised heap memory. This is in contrast to mpls_dump_route(), which fills the very same header and does set rtm_tos = 0. Initialize rtm_tos to 0, matching mpls_dump_route(). Reproduced with KMSAN by adding an MPLS route and issuing a non-RTM_F_FIB_MATCH RTM_GETROUTE for its label: BUG: KMSAN: kernel-infoleak in _copy_to_iter+0x36c/0x33f0 _copy_to_iter+0x36c/0x33f0 __skb_datagram_iter+0x196/0x12c0 skb_copy_datagram_iter+0x5b/0x210 netlink_recvmsg+0x37b/0xef0 ... Uninit was created at: __alloc_skb+0x8ca/0x10e0 mpls_getroute+0x1280/0x3a40 rtnetlink_rcv_msg+0x1138/0x15a0 ... Byte 19 of 64 is uninitialized (byte 19 = nlmsghdr(16) + rtmsg offset 3 = rtm_tos) | ||||
| CVE-2026-74278 | 1 Linux | 1 Linux Kernel | 2026-08-22 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: ALSA: seq: Fix kernel heap address leak in bounce_error_event() The comment above bounce_error_event() documents that user clients should receive SNDRV_SEQ_EVENT_BOUNCE with the original event embedded as variable-length data, while kernel clients should receive SNDRV_SEQ_EVENT_KERNEL_ERROR with a quoted kernel pointer. However, the implementation unconditionally uses SNDRV_SEQ_EVENT_KERNEL_ERROR with data.quote.event set to the raw struct snd_seq_event pointer for all clients. When a bounce error event is delivered to a USER_CLIENT via snd_seq_read(), the kernel heap address in data.quote.event is exposed to userspace through copy_to_user() in the fixed-length branch. This is a distinct leak path from the one addressed by commit 705dd6dcbc0e ("ALSA: seq: Clear variable event pointer on read"), which sanitizes data.ext.ptr in the variable-length branch of snd_seq_read(). The bounce_error_event() leak uses fixed-length events that take the else branch where no sanitization occurs. Differentiate the bounce event by client type. For USER_CLIENT, send SNDRV_SEQ_EVENT_BOUNCE with SNDRV_SEQ_EVENT_LENGTH_VARIABLE and data.ext pointing to the original event. The variable-length path in snd_seq_event_dup() copies the event data into chained cells, and snd_seq_expand_var_event() copies only the content -- never the pointer -- to userspace. For KERNEL_CLIENT, keep the existing SNDRV_SEQ_EVENT_KERNEL_ERROR behavior with the quoted pointer. | ||||