Vulnerabilities
All
My stack
Known exploited
Public exploit
Critical (9+)
Likely exploited (EPSS ≥ 50%)
Changed, 24 h
New, 24 h
Sort:
risk
modified
published
CVSS
EPSS
| CVE | CVSS | EPSS | Vendor, product | Description | Modified |
|---|---|---|---|---|---|
| CVE-2026-98894 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: drm/amd/ras: reset CPER ring on corrupt entry size When CPER ring overflow handling advances the read pointer, it trusts the parsed entry size from the current ring contents. Corrupt CPER data can produce an entry size that does not advance rptr after dword conversion and pointer masking. In that case the recovery loop keeps testing the same location while holding the CPER ring mutex. This can hang the worker that is writing the next CPER record. Detect a no-progress rptr update and reset the CPER ring to an empty state instead. This drops the corrupt contents and lets the writer leave the recovery path without spinning. | Mon 26 Oct |
| CVE-2026-74672 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: mm/vmalloc: acquire init_mm lock on huge vmap to avoid ptdump UAF Patch series "mm: fix UAF caused by race between ptdump and vmap pgtable freeing", v6. Kernel page table walkers fall into two broad categories - those ranges where no exclusion is required via walk_kernel_page_table_range_lockless() and those where exclusion is required via walk_kernel_page_table_range() or walk_page_range_debug(). The former category is used only by arm64 arch code operating on ranges it both wholly owns and does not concurrently write. The latter category consists of kernel page table walkers operating on ranges that are wholly owned (but which need exclusion against concurrent writers). The lock used for exclusion is the mmap lock, and for kernel ranges this is the mmap lock on init_mm. ptdump is a special case being both the only user of walk_page_range_debug(), and the only case in which it walks ranges it does not own. This presents a problem, as page tables may be freed under ptdump. And indeed there is a use-after-free bug in the kernel as a result, which this series addresses. vmap promotes page tables to huge leaf entries where possible, freeing the lower page table when it does. It does this with no meaningful locks held against concurrent ptdump walks. As a result, use-after-free can currently occur. This series addresses the issue by having the vmap huge promotion logic acquire the mmap read lock while both setting the huge page table entry and freeing the prior leaf page table. The ptdump code already acquires the mmap write lock, so by doing so we ensure that the ptdump walker only ever observes either the huge page table entry or the existing page table entry, and nothing is freed underneath it. A mitigation for this issue was already applied for arm64 in commit fa93b45fd397 ("arm64: Enable vmalloc-huge with ptdump"), which this series has to deal with carefully. This mitigation resolves the issue by acquiring the mmap read lock on init_mm on vmap page table free if a ptdump is in progress. However the fix in this series would cause a deadlock if we were to simply apply it for arm64 without also reverting the change. This is because vmap may acquire the read lock before ptdump attempts to acquire the write lock, which then gets queued, and rwsem starvation rules mean that the (unacknowledged) nested mmap read lock in the arm64 code would also block, meaning the original read lock is never released and thus deadlock. This series works around this by #ifndef CONFIG_ARM64'ing the mmap read lock in vmap logic, then partially reverting commit fa93b45fd397 ("arm64: Enable vmalloc-huge with ptdump"), keeping the enablement of huge vmap support, and removing the ifdeffery with the partial revert patch. There are related issues that are also addressed in this series: * x86 page attribute logic, specifically Change Page Attributes (CPA), implements a feature whereby huge ranges can be collapsed into huge leaf entries. This can similarly cause a UAF when done in parallel with a ptdump walk, so similarly acquire the init_mm mmap lock to avoid this. * The CPA logic allows concurrent page table manipulation and CPA collapse, meaning the former risks accessing a page table the latter frees. Fix this by acquiring mmap write lock on init_mm across the whole CPA collapse operation and read lock on the page table manipulation. * x86 and arm64 permit walks of non-kernel mm's (both allowing efi mm walks, and in x86's case arbitrary mm's), so we ensure kernel mappings remain stable by locking the init_mm as well as the mm being walked. The ordering of patches is established for both strict dependencies (the arm64 partial revert in particular has to be done after the vmap changes) and logical ones (the non-kernel mm fix only makes sense once the vmap/CPA fixes are in place). This patch (of 3): Currently there is a nasty ra ---truncated--- | Sat 24 Oct |
| CVE-2026-98666 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: iio: gyro: adis16136: fix unprotected debugfs reads The serial_number file operations are open coded and never call debugfs_file_get(), which debugfs_create_file_unsafe() requires. debugfs_remove_recursive() therefore does not wait for a read in progress, and unbind frees the iio_dev underneath it. Use debugfs_create_file() instead. | 21 Oct |
| CVE-2026-98664 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: iio: imu: adis16400: fix unprotected debugfs reads adis16400_serial_number_fops is open coded and never calls debugfs_file_get(), so debugfs_remove_recursive() does not wait for a read in progress and unbind frees the iio_dev underneath it. Commit ae1d37a9bb4b ("iio: imu: adis16400: use DEFINE_DEBUGFS_ATTRIBUTE instead of DEFINE_SIMPLE_ATTRIBUTE") converted product_id and flash_count to DEFINE_DEBUGFS_ATTRIBUTE, which protects itself, but moved all three files to debugfs_create_file_unsafe(). serial_number prints three registers as "%.4x-%.4x-%.4x" and DEFINE_DEBUGFS_ATTRIBUTE() formats a single u64, so it cannot be converted without changing what the file returns. adis16475 and adis16550 already use debugfs_create_file() for their open coded files. Use it here too. | 21 Oct |
| CVE-2026-98663 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: iio: imu: adis16480: fix unprotected debugfs reads The firmware_revision and firmware_date file operations are open coded and never call debugfs_file_get(), which debugfs_create_file_unsafe() requires. debugfs_remove_recursive() therefore does not wait for a read in progress, and unbind frees the iio_dev underneath it. Use debugfs_create_file() instead. | 21 Oct |
| CVE-2026-90311 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: thermal: hwmon: Remove hwmon class device along with its parent The current code creates one hwmon device per thermal zone type and that device is registered under the first thermal zone of the given type. That turns out to be problematic when the thermal zone holding the hwmon device is removed. For example, say that there are two ACPI thermal zones on a system /sys/devices/virtual/thermal/thermal_zone0/ /sys/devices/virtual/thermal/thermal_zone1/ The current code registers a hwmon class device for thermal_zone0 only: /sys/devices/virtual/thermal/thermal_zone0/hwmon0/ because the type is "acpitz" for both of them, but it adds a sysfs attribute that belongs to thermal_zone1 under it: /sys/devices/virtual/thermal/thermal_zone0/hwmon0/temp2_input There is also /sys/devices/virtual/thermal/thermal_zone0/hwmon0/temp1_input which belongs to thermal_zone0. When thermal_zone0 is removed, say because the ACPI thermal driver is unbound from the underlying platform device, thermal_remove_hwmon_sysfs() skips the removal of hwmon0 because of the temp2_input attribute belonging to thermal_zone1 which effectively prevents thermal_zone0 removal from making progress. Address this by making thermal_remove_hwmon_sysfs() remove the entire hwmon class device interface for the given thermal zone type when the thermal zone device holding it is removed. To prevent races with thermal_add_hwmon_sysfs() that may interfere with this, carry out the entire addition and removal of hwmon sysfs interfaces for thermal zones under thermal_hwmon_list_lock. Also adjust the layout of the labels in thermal_add_hwmon_sysfs() to the current kernel coding style to align with the new "unlock" label. | 21 Oct |
| CVE-2026-98789 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: bpf: Fix objects stuck in free_by_rcu_ttrace do_call_rcu_ttrace() returns early when call_rcu_ttrace_in_progress is set and leaves the objects in free_by_rcu_ttrace. __free_rcu() frees waiting_for_gp_ttrace only and clears the flag. Hence the objects that free_bulk() or __free_by_rcu() added while RCU tasks trace GP was in flight stay in free_by_rcu_ttrace until free_bulk() or alloc_bulk() is called for the same bpf_mem_cache again, which may never happen. The number of such objects is not bounded. Turn call_rcu_ttrace_in_progress into three states: 0 - idle 1 - __free_rcu() is queued 2 - __free_rcu() is queued and free_by_rcu_ttrace got more objects since do_call_rcu_ttrace() sets 2. __free_rcu() does cmpxchg(1 -> 0) and starts the next GP when it fails. It cannot clear the flag first and check free_by_rcu_ttrace later, since bpf_mem_alloc_destroy() frees bpf_mem_cache without waiting for RCU callbacks when the flag is zero. Now __free_rcu() queues itself, so the one that didn't see 'draining' may do call_rcu_tasks_trace() after rcu_barrier_tasks_trace() in free_mem_alloc(). Queue it under rcu_read_lock() and do synchronize_rcu() before the barriers. Calling rcu_barrier_tasks_trace() twice works too, but creating and destroying hash maps in a loop on many cpus slows down to one free_mem_alloc() per GP and kworkers pile up. | 19 Oct |
| CVE-2026-98642 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: bpf: Fix UAF due to concurrent consumption of ttrace lists in alloc_bulk Syzkaller repeatedly triggered UAF splats related to nodes in waiting_for_gp_ttrace within the bpf memalloc: BUG: KASAN: slab-use-after-free in llist_del_first+0x85/0x110 lib/llist.c:61 Read of size 8 at addr ffff8881572cd080 by task syz.4.470/5112 ... llist_del_first+0x85/0x110 lib/llist.c:61 alloc_bulk+0x193/0x460 kernel/bpf/memalloc.c:229 bpf_mem_refill+0x386/0x560 kernel/bpf/memalloc.c:436 Freed by task 14: ... __free_rcu kernel/bpf/memalloc.c:281 [inline] __free_rcu_tasks_trace+0x48/0xd0 kernel/bpf/memalloc.c:291 rcu_tasks_invoke_cbs+0x1ec/0x3e0 kernel/rcu/tasks.h:571 rcu_tasks_one_gp+0x13d/0x220 kernel/rcu/tasks.h:621 rcu_tasks_kthread+0xf3/0x120 kernel/rcu/tasks.h:651 The reason is that the UAF occurs after the RCU Tasks Trace GP expires: when the __free_rcu() callback runs, there is no synchronization protecting llist_del_all() against concurrent alloc_bulk() operating on waiting_for_gp_ttrace, leading to the race condition below: CPU0 CPU1 __free_rcu (RCU Tasks Trace callback) alloc_bulk llist_del_first(&c->waiting_for_gp_ttrace) entry = smp_load_acquire(&head->first); do { if (entry == NULL) return NULL; free_all(llist_del_all(&c->waiting_for_gp_ttrace)) llist_for_each_safe(pos, t, llnode) free_one(pos); next = READ_ONCE(entry->next); <-- trigger UAF } while (!try_cmpxchg(&head->first, &entry, next)); In addition, there is also a theoretical race condition on the free_by_rcu_ttrace list. This race requires two preconditions: an in-flight Tasks Trace GP keeping c->call_rcu_ttrace_in_progress == 1, and concurrent cross-CPU frees repopulating c->free_by_rcu_ttrace with new nodes. Under these conditions, the following scenario triggers UAF: // CPU0 // irq work is still busy (on PREEMPT_RT) alloc_bulk() llist_del_first(&c->free_by_rcu_ttrace) entry = smp_load_acquire(&head->first); do { if (entry == NULL) return NULL; // CPU1 bpf_mem_alloc_destroy() WRITE_ONCE(c->draining, true) // wait for CPU0 irq_work_sync() // CPU2 do_call_rcu_ttrace(tgt(CPU0)) if (c->draining) { llist_del_all(&c->free_by_rcu_ttrace) free_all() } // CPU0 continue next = READ_ONCE(entry->next); <-- trigger UAF while (!try_cmpxchg(&head->first, &entry, next)); Fix this by introducing a raw spinlock to synchronize the concurrent consumption on waiting_for_gp_ttrace and free_by_rcu_ttrace. | 19 Oct |
| CVE-2026-98632 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: Bluetooth: mgmt: Dequeue pending mesh_send_sync entries on cancel In send_cancel(), pending mesh_tx objects are removed from the hdev->mesh_pending list and freed via mesh_send_complete(). However, if a mesh transmission was already queued onto hdev->cmd_sync_work_list via mesh_next(), the queued entry retains a raw pointer to mesh_tx. When hci_cmd_sync_work later processes the entry, it attempts to execute mesh_send_sync and its destroy callback mesh_send_start_complete using the already freed mesh_tx pointer, leading to a use-after-free. Fix this by invoking hci_cmd_sync_dequeue() for mesh_send_sync on the target mesh_tx before completing it. If the entry is found and dequeued, its destroy callback will complete and free the object; otherwise, mesh_send_complete() is called directly. Additionally, ensure the transmission queue advances after cancellation or errors. In mesh_send_start_complete(), call mesh_next() on error unless err is -ECANCELED, because hci_cmd_sync_dequeue() holds hdev->cmd_sync_work_lock and calling mesh_next() synchronously would deadlock. Instead, advance the queue in send_cancel() once the lock is released and if no transmission is in progress. | 19 Oct |
| CVE-2026-98562 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: net: libwx: fix races in Tx timestamp handling wx->ptp_tx_skb is shared between the Tx path, the PTP auxiliary worker and the timestamp cleanup paths. The WX_STATE_PTP_TX_IN_PROGRESS bit prevents multiple Tx paths from submitting timestamp requests, but does not serialize the worker against cleanup. As a result, wx_ptp_clear_tx_timestamp() can free an skb after wx_ptp_tx_hwtstamp_work() has obtained its pointer. The worker may then pass the freed skb to skb_tstamp_tx() and release the same reference again. The cleanup path may also clear the in-progress bit while the worker is still processing the old skb. This allows the Tx path to publish a new skb which the worker can subsequently overwrite with NULL, leaking its reference. Add a dedicated spinlock to protect publication and consumption of the Tx timestamp skb. Detach the skb and clear the in-progress bit while holding the lock, then deliver the timestamp and release the skb after dropping it. Use the same locked cleanup in the quiesce path, but keep the detach there free of register accesses: quiesce runs during PCIe error recovery, where MMIO is not reliable, and it deliberately did not touch the device before. The lock is taken with interrupts disabled, because netpoll can call ndo_start_xmit() with hard interrupts already off. When handling a Tx DMA mapping failure, keep the transmit path reference until after comparing the skb under the lock. This prevents skb address reuse from making the error path mistake a newer timestamp request for the failed one. | 19 Oct |
| CVE-2026-98500 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: HID: hid-oxp: use cancel_delayed_work_sync() in remove oxp_hid_remove() uses cancel_delayed_work() for all three delayed work items. cancel_delayed_work() only dequeues a pending work item without waiting for a currently executing callback to finish. If any of the work callbacks (oxp_rgb_queue_fn, oxp_btn_queue_fn, oxp_mcu_init_fn) is running at the time of removal, the callback continues executing concurrently with hid_hw_close() and hid_hw_stop(), accessing the HID device after it has been closed and stopped. Use cancel_delayed_work_sync() instead to ensure that any in-progress work callback completes before device teardown proceeds. | 19 Oct |
| CVE-2026-98467 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: KVM: arm64: nv: Fix null ptr deref on nested wp/unmap, teardown race Commit 7270cc9157f4 ("KVM: arm64: nv: Handle VNCR_EL2 invalidation from MMU notifiers") introduced VNCR_EL2 invalidation in both kvm_nested_s2_unmap() and kvm_nested_s2_wp(). However at the point of this being performed concurrent stage 2 teardown of a nested guest can cause kvm->arch.mmu.pgt to be set to NULL. This happens in kvm_flush_shadow_all() -> kvm_arch_flush_shadow_all() -> kvm_free_stage2_pgd() and is performed under the kvm->mmu_lock. Commit ec14c272408a ("KVM: arm64: nv: Unmap/flush shadow stage 2 page tables") introduced the teardown of the entire nested MMU range, which then invokes stage2_apply_range() with resched=true: mmu_notifier_invalidate_range_start() -> ... -> kvm_mmu_notifier_invalidate_range_start() -> kvm_mmu_unmap_gfn_range() -> kvm_unmap_gfn_range() -> kvm_nested_s2_unmap() -> kvm_stage2_unmap_range() -> __unmap_stage2_range() -> stage2_apply_range() This means that stage2_apply_range() can drop the kvm->mmu_lock and thus concurrent progress can be made in lockstep with kvm_arch_flush_shadow_all(). If kvm_arch_flush_shadow_all() advances ahead of stage2_apply_range() and completes its operation it guarantees a NULL pointer deref. Since kvm_free_stage2_pgd() is performed under the kvm->mmu_lock this will either be observed NULL or not and serialised against kvm_free_stage2_pgd(). Resolve the issue by abstracting the invalidation to a new function, kvm_invalidate_vncr_ipa_all(), and check that the pgt is non-NULL before dereferencing it. | 19 Oct |
| CVE-2026-98347 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: IB/IPoIB: Avoid restoring OPER_UP after multicast flush ipoib_ib_dev_flush_light() temporarily clears IPOIB_FLAG_OPER_UP to prevent multicast joins while ipoib_mcast_dev_flush() is running, and restores the flag afterwards if it was previously set. This restore races with ipoib_ib_dev_down(). If the interface is brought down while the flush is in progress, ipoib_ib_dev_down() clears IPOIB_FLAG_OPER_UP, but the flush path may set it again after the device has already gone down. Since commit 894021a75291 ("IB/ipoib: Make the carrier_on_task race aware"), ipoib_mcast_carrier_on_task() relies on IPOIB_FLAG_OPER_UP being cleared to terminate its rtnl_trylock() retry loop. If the flag is left set after shutdown, the workqueue retries forever, causing teardown to deadlock when ipoib_ndo_uninit() waits in destroy_workqueue() while holding RTNL. Instead of overloading IPOIB_FLAG_OPER_UP to block multicast joins during a light flush, introduce a dedicated IPOIB_FLAG_MCAST_FLUSH flag. Use it together with IPOIB_FLAG_OPER_UP to determine whether multicast joins are allowed, avoiding the race with device shutdown. | 19 Oct |
| CVE-2026-98278 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: net: remove WARN_ON_ONCE() from the dev_fill_forward_path() loop check ipip_fill_forward_path() and ip6_tnl_fill_forward_path() look up the route to the tunnel's remote endpoint and set ctx->dev to its device, which is the tunnel itself when that route resolves back to the tunnel. dev_fill_forward_path() then makes no progress and trips WARN_ON_ONCE(last_dev == ctx->dev) as soon as a flowtable tries to offload a flow through the tunnel. That routing loop is a configuration any CAP_NET_ADMIN user can set up, and ip_tunnel_xmit() and ip6_tnl_xmit() already treat it as a tx error, so remove the warning and just fail the walk, as commit 008e7a7c293b ("net: remove WARN_ON_ONCE when accessing forward path array") did for the path stack overflow. | 19 Oct |
| CVE-2026-98211 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: mmc: mmci: Fix use-after-free in busy-timeout work ux500_busy_complete() can queue ux500_busy_timeout_work for an R1b command, but mmci_remove() never cancels it. The work can subsequently dereference the devm-allocated mmci_host after it has been released. Mask the controller interrupts and disable the delayed work during removal. This drains any queued instance and stops an IRQ handler that is still in progress from queueing the work again once it has been disabled. This issue was found by an in-house static analysis tool. | 19 Oct |
| CVE-2026-98071 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: net/rds: clear cp_flags bits individually in rds_conn_path_reset() rds_conn_path_reset() wipes the whole flag word with a plain cp->cp_flags = 0 store. Every other accessor of that word uses atomic bitops, and some of them can run concurrently with the reset: RDS_LL_SEND_FULL is set from rds_send_xmit() and cleared from the transport completion paths, neither of which holds anything that excludes the shutdown worker. A plain store racing an atomic read-modify-write on the same word is a data race, and whichever side loses has its update silently discarded. Clear the two bits the reset is actually responsible for instead. RDS_IN_XMIT and RDS_RECV_REFILL need no store at all here: they belong to the caller, rds_conn_shutdown(), which waits for both to be clear before calling the transport shutdown and this reset. This also gives every bit in cp_flags a single well-defined writer discipline, which the following patches rely on when they turn RDS_IN_XMIT and RDS_RECV_REFILL into bit locks held across the teardown: a blanket store mid-teardown would destroy lock ownership that an atomic clear preserves. Oracle UEK carries the same conversion ("net/rds: Preserve essential connection state flags"), motivated by its asynchronous shutdown state machine, whose progress and destroy flags must survive the reset. UEK's variant also clears RDS_IN_XMIT and RDS_RECV_REFILL because there the reset runs as the final step of a teardown that owns both bits, making those clears its unlock. Upstream that release belongs in rds_conn_shutdown(): once a later patch in this series turns the two bits into locks held across the teardown, ending ownership needs release semantics and a wake-up that a plain clear inside the reset would not provide. Based on Oracle UEK commit "net/rds: Preserve essential connection state flags" by Gerd Rausch. | 19 Oct |
| CVE-2026-98068 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: net/rds: don't let rds_conn_shutdown() consume a concurrent drop rds_conn_shutdown() finishes by moving the path from RDS_CONN_DISCONNECTING to RDS_CONN_DOWN, and also accepts RDS_CONN_ERROR as the starting state of that final transition, so that a FIN processed in softirq context during the teardown does not derail the shutdown into a noisy error path. But consuming that RDS_CONN_ERROR also consumes the shutdown pass that came with it: rds_conn_path_drop() sets RDS_CONN_ERROR and then queues cp_down_w, and a pass that starts on a path already in RDS_CONN_DOWN is a no-op. For the FIN case that is harmless - the socket the FIN arrived on is the very socket the teardown just released. It is not harmless for a dropper that attached something to the path first. rds_tcp_accept_one() is such a dropper. Its path claim in rds_tcp_accept_one_path() transitions RDS_CONN_DOWN -> RDS_CONN_CONNECTING, and a concurrent drop - a FIN on a previous socket in softirq context, an administrative reset - can put the path into RDS_CONN_ERROR between that claim and the state check that follows, which accepts RDS_CONN_ERROR. The accept then installs the freshly accepted socket with rds_tcp_set_callbacks() while the queued teardown - which sampled tc->t_sock before this socket existed - is still running. rds_connect_path_complete() fails its transition to RDS_CONN_UP and drops the path again, queueing the pass that should reap the socket it just installed. If the in-flight shutdown's final transition consumes that drop's RDS_CONN_ERROR, the queued pass finds the path in RDS_CONN_DOWN and does nothing. The installed socket is never torn down: it sits established with its callbacks armed and its rds_tcp_connection on rds_tcp_tc_list, the peer sees a connection that nothing ever reads, and the path is wedged in RDS_CONN_DOWN until some later event drops it again. Reproduced with widened race windows as an ever-growing receive queue on a socket owned by a path stuck in RDS_CONN_DOWN, with the peer's send path wedged behind it. Make the final transition only DISCONNECTING -> DOWN. If it fails because the path is in RDS_CONN_ERROR, a drop raced the teardown: cancel the reconnect timer and clear RDS_RECONNECT_PENDING - the one piece of the skipped tail that must not be left behind - and return, letting the pass the drop queued finish the job: it tears down whatever attached to the path in the meantime, completes the transition to RDS_CONN_DOWN, and re-arms the reconnect from its own tail. The timer quiesce in that branch matters because the racing drop does not always queue that pass: rds_conn_path_drop() returns without queueing when a destroy is pending - exactly the situation during a netns teardown or module unload, when a FIN on the dying socket is processed while rds_conn_path_destroy() flushes cp_down_w. If the flushed pass is the one that takes this return, no later pass exists, and rds_conn_path_destroy() would find cp_conn_w still armed (WARN_ON) and then free a path whose reconnect timer can still fire. With the cancel in the branch, every exit of a shutdown pass leaves the timer quiesced no matter which pass completes the transition. The FIN case keeps making progress, one pass later and still without noisy logging. Any other state keeps today's rds_conn_path_error() handling; no current cp_state writer can leave a DISCONNECTING path in anything but RDS_CONN_ERROR (every other writer is a cmpxchg from a non-DISCONNECTING state), so that branch is defensive. On kernels without the preceding patches the same hazard exists with the sample-based quiesce; the fix applies there equally. | 19 Oct |
| CVE-2026-98060 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: bpf: Reject resilient lock operations in rbtree callbacks __bpf_rbtree_add() keeps parent and link pointers live across calls to the program-supplied comparison callback. The verifier therefore requires the root's lock to remain held throughout the callback. The helper path enforces this rule for bpf_spin_lock() and bpf_spin_unlock(), but the resilient lock kfunc argument path does not. Since resilient locks may protect BPF rbtree roots, a callback can release the root lock and let another CPU remove and free the node referenced by the in-progress tree walk. The walk then resumes using freed pointers. Reject resilient lock kfuncs in an rbtree comparison callback, matching the existing policy for the spin lock helpers. Resilient-lock-protected trees remain valid when their comparison callbacks leave lock state alone. | 19 Oct |
| CVE-2026-97996 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: virtio: fix use-after-free in unregister_virtio_device() device_unregister() is device_del() plus put_device(). When the caller holds no extra reference, that drops the last one and runs the release callback, which for several transports frees the memory the embedded struct virtio_device sits in. unregister_virtio_device() then calls virtio_debug_device_exit(), which reads dev->debugfs_dir out of the freed object. Affected transports are the ones whose release callback frees and whose remove path takes no reference: virtio_mmio, virtio_vdpa, virtio_uml, mlxbf-tmfifo and virtio_ccw. virtio_pci is unaffected because virtio_pci_remove() brackets the call with get_device() and put_device(). Remove the debugfs entries before the device can go away. They are only accessed through the protected debugfs interface, so debugfs_remove_recursive() waits for in-progress file operations before returning. Tearing them down while the device is still alive is therefore safe. Reproduced on User-Mode Linux with CONFIG_KASAN and CONFIG_VIRTIO_DEBUG by unbinding a virtio-uml device: BUG: KASAN: slab-use-after-free in virtio_debug_device_exit+0x36/0x4d Read of size 8 at addr 00000000616e0b10 by task init/1 __asan_report_load8_noabort virtio_debug_device_exit+0x36/0x4d unregister_virtio_device+0x48/0x75 virtio_uml_remove platform_remove device_release_driver_internal unbind_store Freed by task 1: kfree virtio_uml_release_dev device_release kobject_put put_device device_unregister With this applied, the report is gone and unbind is clean. | 19 Oct |
| CVE-2026-93220 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: sched_ext: Keep kick_sync waiting on the rq's own CPU kick_sync_wait_bal_cb() assumes it runs on the rq's CPU from the __schedule() tail: the snapshots it compares against live in that CPU's percpu area and the busy-wait runs with the rq lock dropped and IRQs enabled. However, dispatch can now drop the rq lock while the callback sits queued, and rq lock takers in that window (the sched class change paths, the scx task iterator) flush pending balance callbacks on release, running the callback on a foreign CPU. Such a run compares against unrelated snapshots and can deadlock when the executing CPU is itself a wait target. Bail on a foreign CPU and leave the wait state alone. The wait only observes progress that the resched kicks already guarantee and the rq's next wait picks up the stale cpus_to_sync bits. | 19 Oct |
| CVE-2026-93068 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: drm/amd/display: Fix DM I2C teardown race DM I2C adapters can remain visible to userspace while DM teardown is already in progress. A concurrent i2c-dev transfer may then enter amdgpu_dm_i2c_xfer() after the backing DM state has been torn down, leading to a NULL pointer dereference. Create a devres group around the DM I2C adapter lifetime and release it at the start of dm_hw_fini(), before HPD, IRQ, and DM state are torn down. This removes the I2C adapters first and waits for in-flight users to drain before the structures used by amdgpu_dm_i2c_xfer() disappear. This fixes a teardown ordering race seen during device removal: BUG: kernel NULL pointer dereference RIP: amdgpu_dm_i2c_xfer+0x122/0x1c0 [amdgpu] Call Trace: __i2c_transfer i2c_transfer i2cdev_ioctl_rdwr | 19 Oct |
| CVE-2026-90391 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: lib/test_hmm: fail dmirror_fault() when the mirrored mm is gone dmirror_fault() is called from the dmirror_read() and dmirror_write() retry loops after dmirror_do_read() or dmirror_do_write() finds a missing device page table entry. If the mirrored mm has already exited, mmget_not_zero() fails. The current code returns 0 in that case, which tells the caller that faulting succeeded even though no page was faulted and no device page table entry was installed. The caller then retries the same address, hits -ENOENT again, and can loop forever without making progress. Return -EFAULT instead, so the ioctl fails when the mirrored mm is no longer faultable. | 19 Oct |
| CVE-2026-90261 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: btrfs: zoned: flush active metadata block group at btree_writepages() start btree_writepages() writes the btree inode's dirty metadata in ascending logical address order. On a zoned filesystem only one metadata and one system block group is active for writing at a time, and check_bg_is_active() (via btrfs_check_meta_write_pointer()) pivots the active block group as writeback moves from one block group to the next. If the active block group sits at a higher logical address than another block group that also holds dirty metadata, the ascending walk reaches the lower one first and, to write it, has to finish the active block group and activate the lower one. It cannot finish a block group that still has unsent IO, and during WB_SYNC_ALL && !for_sync (commit) writeback it deliberately refuses to wait for that IO under fs_info->zoned_meta_io_lock, as that can deadlock. The pivot thus cannot issue the submission itself either, so it gives up: btrfs_check_meta_write_pointer() returns -EAGAIN, which btrfs_write_and_wait_transaction() treats as fatal and aborts the transaction, forcing the filesystem read-only. This happens intermittently under metadata-heavy relocation (e.g. fstests btrfs/187). Flush the active metadata and system block groups at the start of btree_writepages(), under the fs_info->zoned_meta_io_lock it already holds, so they have no unsent IO left and the later pivot can finish them and make forward progress. | 19 Oct |
| CVE-2026-90181 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: ublk: avoid teardown retry loop on xarray allocation failure __ublk_shmem_remove_ranges() removes matching maple tree ranges in batches, but first stores each range into a temporary xarray so that the pages can be unpinned after dropping the maple tree lock. That temporary xarray is filled under the maple tree lock with xa_store(..., GFP_ATOMIC). If the store fails before mas_erase(), the current range is left in the tree and the helper returns false. The outer ublk_shmem_remove_ranges() loop then immediately retries the same range. While the atomic allocation keeps failing, the teardown path has no forward progress. The issue can be reproduced with radix_tree_node failslab injection after a SHMEM_ZC buffer has already been registered: # Kernel config: # CONFIG_BLK_DEV_UBLK=y # CONFIG_DEBUG_FS=y # CONFIG_FAULT_INJECTION=y # CONFIG_FAULT_INJECTION_DEBUG_FS=y # CONFIG_FAILSLAB=y echo 10 > /proc/sys/vm/nr_hugepages mkdir -p /tmp/htlb mount -t hugetlbfs none /tmp/htlb fallocate -l 4M /tmp/htlb/ublk_buf dev_id=$(kublk add -t null --shmem_zc \ --htlb /tmp/htlb/ublk_buf | awk -F '[ :]' '/dev id/ {print $3}') echo 1 > /sys/kernel/slab/radix_tree_node/failslab echo Y > /sys/kernel/debug/failslab/cache-filter echo Y > /sys/kernel/debug/failslab/ignore-gfp-wait echo 1 > /sys/kernel/debug/failslab/interval echo -1 > /sys/kernel/debug/failslab/times echo 100 > /sys/kernel/debug/failslab/probability kublk del -n "$dev_id" On the unfixed kernel the delete command was still running after 3 seconds. Disabling failslab made it return. The fault-injection stack showed: should_failslab kmem_cache_alloc_lru_noprof __xas_nomem __xa_store xa_store __ublk_shmem_remove_ranges ublk_cdev_rel ublk_ctrl_del_dev Remove the allocation from the teardown loop. Keep the existing batch limit, but collect {base_pfn, nr_pages} pairs in a fixed-size stack array. Once a matching range is found, the range is erased from the maple tree before dropping the lock, so each successful scan makes progress without depending on any GFP_ATOMIC allocation. With the same failslab settings, the fixed kernel completed "kublk del -n $dev_id" successfully in about 45 ms. | 19 Oct |
| CVE-2026-90180 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: block: mtip32xx: synchronize ioctls with device removal The ioctl handlers only test REMOVE_PENDING before entering mtip_hw_ioctl(). Removal can set that bit immediately afterwards and free dd->port in mtip_hw_exit() while an ioctl still dereferences it. An already open block device can reach the handlers while del_gendisk() is in progress. Serialize both native and compat ioctls with removal. Set REMOVE_PENDING before taking the mutex so new callers fail after an in-flight ioctl has drained, and hold the mutex until the port has been torn down. | 19 Oct |
| CVE-2026-89991 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: bpf: Fix infinite loop in pcpu_freelist push with one possible CPU __pcpu_freelist_push() can loop forever when only one CPU is possible and an NMI re-enters pcpu_freelist_push() while the interrupted context holds that CPU's freelist lock. After the current-CPU fast path fails, the fallback loop walks cpu_possible_mask while skipping the current CPU. With CONFIG_SMP=n, or when an SMP kernel is limited to one possible CPU with nr_cpus=1 or possible_cpus=1, there are no other possible CPUs to examine. The loop therefore makes no lock acquisition attempt and can never make progress. The following stack was observed on a UP system: NMI context: pcpu_freelist_push free_htab_elem htab_map_delete_elem [perf-event BPF program] __perf_event_overflow perf_event_nmi_handler exc_nmi Interrupted context: __pcpu_freelist_push pcpu_freelist_push free_htab_elem htab_map_delete_elem [raw_tp/sys_enter BPF program] __bpf_trace_sys_enter do_syscall_64 raw_res_spin_lock() detects the same-CPU recursive acquisition and returns -EDEADLK, but the subsequent fallback loop has no candidate head on a system with one possible CPU. Restore the extra fallback head that existed before the rqspinlock conversion. Keep the current-CPU fast path, then try the other possible CPUs and finally the extra head. The additional head lets a push, which cannot fail without losing a preallocated element, make progress when the only per-CPU head is held by the interrupted context. Also check the extra head from the pop path so that nodes placed there can be reused. | 19 Oct |
| CVE-2026-89807 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: drm/amdkfd: guard against NULL restore_mqd in CRIU queue restore Both create_queue_cpsch() and create_queue_nocpsch() unconditionally call mqd_mgr->restore_mqd() when a CRIU restore is in progress (qd != NULL), with no NULL guard. On any system where restore_mqd is not implemented for the given queue type, a user holding CAP_CHECKPOINT_RESTORE can trigger a kernel NULL pointer dereference and panic the machine by issuing KFD_IOC_CRIU_OP_RESTORE with a crafted queue restore object. Note that checkpoint_mqd is likewise unimplemented on GFX12, so no legitimate CRIU image can reach this path — only a hand-crafted restore payload. Add a NULL guard for restore_mqd immediately after mqd_mgr is resolved, unwinding via the existing error labels and returning -EOPNOTSUPP if the callback is not implemented. This mirrors the existing checkpoint_mqd guard in checkpoint_mqd(). | 19 Oct |
| CVE-2026-80983 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: net/smc: fix socket refcount leak in smc_switch_conns() smc_switch_conns() takes a reference on the SMC socket before dropping lgr->conns_lock, so the connection stays alive while the CDC slot is fetched: sock_hold(&smc->sk); read_unlock_bh(&lgr->conns_lock); /* pre-fetch buffer outside of send_lock, might sleep */ rc = smc_cdc_get_free_slot(conn, to_lnk, &wr_buf, NULL, &pend); if (rc) goto err_out; The err_out label only drops the wr_tx link reference, so this early exit returns without the matching sock_put(). The second error exit is not affected, because sock_put() has already run by then. A leaked sk_refcnt means the smc_sock is never destroyed. Its send and receive buffers stay allocated, and for a user socket the reference held on the network namespace is never released, so the netns can no longer be torn down. smc_cdc_get_free_slot() fails when the target link goes down or when the connection has been killed while the switch is in progress. Both are reachable during the link failover this function implements, so the leak is triggered by the same hardware events that make smc_switch_conns() run in the first place. Restructure so there is a single sock_put() covering both outcomes, instead of adding a second one to the error path. | 19 Oct |
| CVE-2026-80793 | unscored | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: ipv4: reject undersized MTUs in ip_do_fragment() ip_do_fragment() subtracts the IPv4 header length from the effective MTU and passes the resulting payload MTU to ip_frag_next(). If the effective MTU is smaller than hlen + 8, ip_frag_next() rounds the fragment payload length down to zero. The fragmentation state then never makes forward progress: state->left, state->ptr and state->offset stay unchanged while ip_do_fragment() keeps allocating and transmitting header-only fragments until the softlockup detector fires. This is reproducible with a route installed using "mtu lock 20", but it is also reproducible without route MTU lock, for example by forwarding a packet to a device whose MTU is 20. Fix it in ip_do_fragment() by rejecting mtu < hlen + 8 with -EMSGSIZE, matching the existing IPv6 fragmentation check. | 19 Oct |
279 of 279 · Previous
Download these 279 as CSV · subscribe to this list.
EPSS scores: 2026-10-29. NVD cursor: 2026-10-29 00:22. The News page shows only notable CVEs (KEV, your stack, new criticals, EPSS over 50%, or active exploitation per SSVC); this table has all of them.