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| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-5485 | 2 Amazon, Linux | 3 Amazon Athena Odbc Driver, Athena Odbc, Linux Kernel | 2026-10-20 | 7.8 High |
| OS command injection in the browser-based authentication component in Amazon Athena ODBC driver before 2.0.5.1 on Linux might allow a threat actor to execute arbitrary code by using specially crafted connection parameters that are loaded by the driver during a local user-initiated connection. To remediate this issue, users should upgrade to version 2.0.5.1 or later. | ||||
| CVE-2026-35561 | 4 Amazon, Apple, Linux and 1 more | 5 Amazon Athena Odbc Driver, Athena Odbc, Macos and 2 more | 2026-10-20 | 7.4 High |
| Insufficient authentication security controls in the browser-based authentication components in Amazon Athena ODBC driver before 2.1.0.0 might allow a threat actor to intercept or hijack authentication sessions due to insufficient protections in the browser-based authentication flows. To remediate this issue, users should upgrade to version 2.1.0.0. | ||||
| CVE-2026-98158 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: ppp_async: drop the errored frame instead of resetting its headroom ppp_receive_nonmp_frame() prepends a two-byte direction tag before running the pass/active BPF filters: *(__be16 *)skb_push(skb, 2) = htons(PPP_FILTER_INBOUND_TAG); Nothing on the receive path guarantees those two bytes of headroom. The frame-error path in ppp_async's process_input_packet() resets a reused skb's headroom to zero while claiming to restore it to a freshly allocated state - but a fresh skb from dev_alloc_skb() carries NET_SKB_PAD: err: if (skb) { /* make skb appear as freshly allocated */ skb_trim(skb, 0); skb_reserve(skb, - skb_headroom(skb)); } ap->rpkt still points at that skb, so the next frame is reassembled into it with no headroom at all. A peer that sends a bad-FCS frame followed by one beginning ff 03 then leaves a single byte of headroom by the time the filter tag is pushed, which lands one byte below skb->head: skbuff: skb_under_panic: len:49 put:2 head:ffff888003c10000 data:ffff888003c0ffff tail:0x30 end:0x640 dev:<NULL> kernel BUG at net/core/skbuff.c:214! RIP: 0010:skb_panic+0x13e/0x230 Call Trace: skb_push+0xbd/0x100 ppp_receive_nonmp_frame+0x48a/0x1d10 ppp_input+0x4e9/0x2f80 ppp_async_process+0x2a/0xe0 tasklet_action_common+0x20f/0x8a0 handle_softirqs+0x18e/0x590 Kernel panic - not syncing: Fatal exception in interrupt Zeroing the headroom violates the NET_SKB_PAD guarantee that dev_alloc_skb() gives the rest of the receive path. Besides the filter panic above, when CCP compression is enabled ppp_decompress_frame() hands skb->data - 2 to ->decompress()/->incomp(), which then reads out of bounds before skb->head for the same reason. Rather than restore the headroom, drop the errored frame - as ppp_synctty already does on its error path - and clear ap->rpkt so the next frame is reassembled into a fresh skb with proper headroom. This is simpler and fixes both the filter under-panic and the CCP out-of-bounds read. The original V1 of this patch made room in ppp_receive_nonmp_frame() with skb_cow_head(); Eric pointed out that fixing the root cause in the transport is the right approach. Found by fuzzing the PPP receive path with a mutating peer on a pty; it is an interesting (remote) DoS: root configures PPP, the peer supplies two crashing frames. The reproducer (repro-ppp-skb.c, unchanged from v1) panics in about a second, and returns cleanly with this applied. | ||||
| CVE-2026-98157 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: EDAC/device_sysfs: Use kstrtouint() for poll_msec to prevent truncation The poll_msec sysfs store file uses simple_strtoul() which accepts an unsigned long, but the target field (poll_msec) is unsigned int. On 64-bit systems, a value > UINT_MAX is silently truncated when stored. Fix the mismatch by using kstrtouint() instead. This rejects values larger than UINT_MAX at parse time, making truncation impossible. Also add a check for value < 1 to reject the 0-delay case, which would cause the poll work to spin without delay and consume 100% CPU. | ||||
| CVE-2026-98155 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 7.1 High |
| In the Linux kernel, the following vulnerability has been resolved: accel/qaic: Address potential out-of-bounds read in resp_worker() Although 'commit 2feec5ae5df7 ("accel/qaic: Handle DBC deactivation if the owner went away")' fixes the scenario it was intended for by walking the message and only decoding QAIC_TRANS_DEACTIVATE_FROM_DEV, if present, it skipped over the bounds checking code that is included in decode_message(). This could lead to issues such as reading past the slab allocation's end, infinite loops or kernel panics. For those issues to happen, a malformed wire message is needed to be sent from the device. Instead of duplicating the bounds checking code already present in decode_message(), use the function inside resp_worker(). | ||||
| CVE-2026-98154 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 7 High |
| In the Linux kernel, the following vulnerability has been resolved: nvme-rdma: fix -EIO cleanup order in queue_rq On -EIO, the RDMA queue_rq path reports a host path error and then still cleans up the command and unmaps the SQE DMA. The path error helper completes the request, so that is double cleanup and DMA unmap after the request is already complete. Unmap the SQE first, then report the host path error. Skip the outer command cleanup on that path. | ||||
| CVE-2026-80726 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 8.8 High |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. | ||||
| CVE-2026-63887 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 9.8 Critical |
| In the Linux kernel, the following vulnerability has been resolved: scsi: target: iscsi: Bound iscsi_encode_text_output() appends to rsp_buf iscsi_encode_text_output() concatenates "key=value\0" records into login->rsp_buf, an 8192-byte kzalloc(MAX_KEY_VALUE_PAIRS) buffer allocated in iscsit_alloc_login_setup_buffer(). The three sprintf() call sites in this function (lines 1398, 1411, 1424 in v7.1-rc2) never check the remaining buffer capacity: *length += sprintf(output_buf, "%s=%s", er->key, er->value); *length += 1; output_buf = textbuf + *length; The 8192-byte ceiling at iscsi_target_check_login_request() bounds the *input* Login PDU payload, but a single PDU can carry up to 2048 minimal four-byte "a=b\0" pairs, each unknown key expanding to a 16-byte "a=NotUnderstood\0" output record via iscsi_add_notunderstood_response(). 2048 * 16 = 32 KiB of output into an 8 KiB buffer, producing a ~24 KiB heap overrun in the kmalloc-8k slab. The fix introduces a static iscsi_encode_text_record() helper that uses snprintf() with a per-call bounds check against the remaining buffer, and threads a u32 textbuf_size parameter through iscsi_encode_text_output(). Both call sites in iscsi_target_handle_csg_zero() (PHASE_SECURITY) and iscsi_target_handle_csg_one() (PHASE_OPERATIONAL) pass MAX_KEY_VALUE_PAIRS. On overflow the encoder logs the condition, calls iscsi_release_extra_responses() to drop queued records, and returns -1; both caller sites now emit ISCSI_STATUS_CLS_INITIATOR_ERR / ISCSI_LOGIN_STATUS_INIT_ERR via iscsit_tx_login_rsp() before returning, so the initiator sees an explicit failed-login response rather than a silent connection drop. (Prior to this patch only the PHASE_OPERATIONAL caller did that; the PHASE_SECURITY caller is converted to the same shape.) | ||||
| CVE-2026-98506 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 4.1 Medium |
| In the Linux kernel, the following vulnerability has been resolved: mm/hugetlb: do not dissolve gigantic pages without runtime support dissolve_free_hugetlb_folio() doesn't check hstate_is_gigantic_no_runtime(h) though remove_hugetlb_folio()/ update_and_free_hugetlb_folio() silently bail for such folios, so it frees a still-listed folio and, on vmemmap restore failure, the add_hugetlb_folio() rollback corrupts the free list. | ||||
| CVE-2026-64524 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 7.7 High |
| In the Linux kernel, the following vulnerability has been resolved: drm/hyperv: validate resolution_count and fix WIN8 fallback A SYNTHVID_RESOLUTION_RESPONSE with resolution_count > 64 walks past the supported_resolution[SYNTHVID_MAX_RESOLUTION_COUNT] array in the parse loop. Bound resolution_count against the array size, folded into the existing zero-check. When the WIN10 resolution probe fails, the caller in hyperv_connect_vsp() left hv->screen_*_max / preferred_* unpopulated, which sets mode_config.max_width / max_height to 0 and makes drm_internal_framebuffer_create() reject every userspace framebuffer with -EINVAL. The pre-WIN10 branch had the same gap for preferred_width / preferred_height. Use a single post-probe fallback guarded by screen_width_max == 0 so both paths converge on the WIN8 defaults. | ||||
| CVE-2026-98467 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 4.7 Medium |
| 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. | ||||
| CVE-2026-98519 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 1.9 Low |
| In the Linux kernel, the following vulnerability has been resolved: drm/amdgpu: Fix runtime PM leak in amdgpu_debugfs_test_ib_show() amdgpu_debugfs_test_ib_show() resumes the device with pm_runtime_get_sync() before taking the reset domain semaphore with down_write_killable(). If the write lock acquisition is interrupted, the function returns without calling pm_runtime_put_autosuspend(), leaking the runtime PM reference acquired for the device and keeping the GPU awake. Drop the runtime PM reference on the interrupted down_write_killable() error path before returning. (cherry picked from commit ec30a576c2d4c0364549e6c04218f50704ef56c8) | ||||
| CVE-2026-98527 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 2.5 Low |
| In the Linux kernel, the following vulnerability has been resolved: gpio: zynq: fix runtime PM leak on request error path pm_runtime_get_sync() leaves the usage counter incremented even when it fails, and zynq_gpio_request() returns the error without dropping it. gpiolib does not call ->free() when ->request() fails, so zynq_gpio_free(), which holds the only matching pm_runtime_put(), never runs. The reference is leaked and the controller can no longer runtime-suspend, so its clock stays enabled. Switch to pm_runtime_resume_and_get(), which only increments the usage counter on success. | ||||
| CVE-2026-98536 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 4.7 Medium |
| In the Linux kernel, the following vulnerability has been resolved: writeback: report a Tasks-RCU quiescent state per cgwb drain pass cleanup_offline_cgwbs_workfn() drains a dying cgwb by calling cleanup_offline_cgwb() until it returns false, with a cond_resched() between passes. On a CONFIG_PREEMPTION kernel that cond_resched() does nothing: _cond_resched() is a plain "return 0", and under PREEMPT_DYNAMIC the full and lazy modes disable it. Since commit 7dadeaa6e851 ("sched: Further restrict the preemption modes") those are the only two models on the architectures with PREEMPT_LAZY support, arm64 and x86 among them, so the drain loop never reports a Tasks-RCU quiescent state. A worker draining a cgwb with millions of attached inodes runs for minutes. On a 6.18 arm64 host in lazy mode the cgwb worker drained one dying cgroup's writeback domain for over 11 minutes. A BPF program unlink (bpf_trampoline_unlink_prog -> bpf_trampoline_update -> unregister_ftrace_direct -> ftrace_shutdown -> synchronize_rcu_tasks()) waited on that grace period while holding the trampoline mutex, 42 tasks queued behind it in D state, and the hung task detector fired at 614 s and panicked the host. Any BPF or ftrace detach during a long drain inherits the drain's length. Fix this by calling cond_resched_tasks_rcu_qs() so we do not stall out anybody who calls sycnrhonize_rcu_tasks(). We put this in a do { } while loop because if we have many small cgroups cleanup_offline_cgwb() will return false and we will never call cond_resched_tasks_rcu_qs(), creating the same problem. | ||||
| CVE-2026-98495 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: net: arp: terminate device name before lookup The ARP ioctl copies a user-provided struct arpreq into a stack object. Its arp_dev field may contain IFNAMSIZ bytes without a NUL terminator. Such input is passed to dev_get_by_name_rcu() or __dev_get_by_name(), where strcmp() can read past the end of the stack object when a matching alternative interface name exists. Terminate the field before the lookup to prevent the out-of-bounds read. | ||||
| CVE-2026-98523 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 4.7 Medium |
| In the Linux kernel, the following vulnerability has been resolved: drm/client: fix restore of partially initialized client I got a null-ptr-deref report when closing a DRM file descriptor: WARNING: drivers/gpu/drm/drm_atomic.c:2031 at __drm_atomic_helper_set_config+0x18e/0x1b0 [drm] Call Trace: drm_client_modeset_commit_atomic+0x16b/0x220 [drm] drm_client_modeset_commit_locked+0x56/0x160 [drm] drm_client_modeset_commit+0x21/0x40 [drm] __drm_fb_helper_restore_fbdev_mode_unlocked.part.0+0x7b/0x80 drm_fbdev_client_restore+0xe/0x20 [drm_client_lib] drm_client_dev_restore+0x9f/0xc0 [drm] drm_release+0xc5/0xe0 [drm] The warning is followed by a NULL pointer dereference: BUG: kernel NULL pointer dereference, address: 0000000000000008 RIP: __drm_fb_helper_restore_fbdev_mode_unlocked.part.0+0x41/0x80 [drm_kms_helper] Call Trace: drm_fbdev_client_restore+0xe/0x20 [drm_client_lib] drm_client_dev_restore+0x9f/0xc0 [drm] drm_release+0xc5/0xe0 [drm] __fput+0xdc/0x2b0 __x64_sys_close+0x39/0x80 do_syscall_64+0x8d/0x460 entry_SYSCALL_64_after_hwframe+0x76/0x7e drm_client_register() adds the DRM client to the device client list before invoking the initial hotplug callback. If the hotplug callback fails, the client remains registered. For the fbdev client, a failure during drm_fb_helper_initial_config() causes the partially initialized fbdev helper to be cleaned up. drm_fb_helper_fini() releases fb_helper->info and leaves it NULL. The fbdev client therefore remains registered even though there is no fully initialized framebuffer device. Later, when userspace closes the DRM file descriptor, drm_release() can invoke the restore callbacks of registered DRM clients: drm_release() drm_client_dev_restore() drm_fbdev_client_restore() drm_fb_helper_restore_fbdev_mode_unlocked() drm_fbdev_client_restore() currently restores the fbdev state unconditionally. For a partially initialized fbdev client this can submit an incomplete modeset state and subsequently access fbdev state which has not been initialized, resulting in the warning and NULL pointer dereference above. drm_fbdev_client_unregister() already uses fb_helper->info to distinguish a fully probed framebuffer device from a partially initialized client. Use the same condition in drm_fbdev_client_restore() and skip restore if no framebuffer device has been successfully initialized. | ||||
| CVE-2026-98538 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 4.7 Medium |
| In the Linux kernel, the following vulnerability has been resolved: writeback: bound cleanup_offline_cgwb() rescans by rotating scanned inodes cleanup_offline_cgwb() prepares at most WB_MAX_INODES_PER_ISW inodes per call and is called again until the dying wb is drained, but every call walks wb->b_attached and then wb->b_dirty_time from the same end. Inodes already prepared (they stay on the list with I_WB_SWITCH set until the switch worker runs) and inodes that cannot be switched (I_FREEING, I_WILL_FREE, !SB_ACTIVE, DAX, already on the target wb) stay where they are, so each pass rescans a growing run of them under wb->list_lock and a full drain is quadratic in the number of inodes on the list. With ~17M inodes attached to one dying cgwb we saw this end in soft lockups, with CPUs reported stuck for 21-48s. Walk both lists from the oldest end and move every scanned inode to the newest end, so the next pass starts where the previous one stopped and the drain becomes linear. b_attached is unordered, so nobody sees the reorder there. b_dirty_time is ordered by dirtied_when, but the oldest unscanned inode stays at the end move_expired_inodes() picks from, sync takes the whole list regardless of order, and prepared inodes leave the list as soon as the switch work runs and get a new dirtied_time_when on the new wb anyway, so the only inodes left out of order are the ones that can never switch (DAX), and only on the dying wb. | ||||
| CVE-2026-98459 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: Bluetooth: ISO: balance the parent hold in hci_bind_bis() hci_conn_link() takes a lifetime reference to its parent with hci_conn_get(), but only takes an operational hold on the child. hci_conn_unlink() later balances both a hold and a reference on the parent. The SCO and CIS paths pass a parent acquired from a connect helper, so it already has a hold. For an additional BIS, hci_bind_bis() obtains the parent from hci_conn_hash_lookup_big(), which returns a bare pointer. Unlinking the child then drops the parent's existing hold and can schedule it for disconnection while its socket is still using it. Take a hold on the parent before linking it and drop that hold if linking fails. A successful link transfers the hold to hci_conn_unlink(). | ||||
| CVE-2026-98462 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: Bluetooth: hci_conn: fix CIS hold ownership on reuse Commit 69997d50ec57 ("Bluetooth: ISO: handle bound CIS cleanup via hci_conn") made hci_bind_cis() and hci_connect_cis() return a connection with one hold for the ISO layer. hci_bind_cis() currently takes that hold only after configuring a CIS, so its BT_CONNECTED and matching BT_BOUND paths return a bare lookup result. Its configuration failure path can likewise call hci_conn_drop() before taking a hold. Take the hold before any state-dependent return or configuration error so every successful return follows the documented ownership contract and every error drop is balanced. hci_connect_cis() also assumes hci_conn_link() always takes a new CIS hold before dropping the one returned by hci_bind_cis(). However, the helper returns an existing link without taking another hold. In that case, preserve the CIS hold for the caller and drop the redundant LE hold because the existing link already owns its parent hold. Returning early also avoids changing an existing CIS back to BT_CONNECT. | ||||
| CVE-2026-98463 | 1 Linux | 1 Linux Kernel | 2026-10-20 | 4.1 Medium |
| In the Linux kernel, the following vulnerability has been resolved: sched_ext: Derive SCX_RQ_IN_WAKEUP from the core enqueue flags schedule_deferred_locked() skips scheduling a deferred action while SCX_RQ_IN_WAKEUP is set and relies on the task_woken_scx() call that follows a wakeup enqueue to run it. enqueue_task_scx() sets the flag from the merged enqueue flags, which include the flags stashed for a remote activation. move_remote_task_to_local_dsq() thus sets SCX_RQ_IN_WAKEUP on the destination rq when the moved task was woken up, although no task_woken_scx() follows that activation. An IMMED insert into a busy destination requests a local reenqueue during that enqueue. The request gets linked but not scheduled and stays pending until an unrelated wakeup or preemption on that CPU runs the deferred actions. The IMMED task sits behind the running task in the meantime. If nothing runs them before the scheduler is disabled, the request outlives the scheduler and points into its freed per-cpu area, which the next scheduler dereferences from run_deferred(). Test the core enqueue flags for the wakeup bit. Only the core's wakeup path is followed by task_woken_scx(). | ||||