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| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-90291 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: module/dups: Fix use-after-free in kmod_dup_req lifetime handling The kmod dups code uses RCU to ensure that a kmod_dup_req instance is freed only after it is no longer referenced. When releasing an instance, the kmod_dup_request_delete() function removes the kmod_dup_req from the dup_kmod_reqs list, waits via synchronize_rcu() and finally frees it. However, this doesn't work correctly because parallel users referencing the instance in kmod_dup_request_exists_wait() don't enter an RCU read-side critical section. This can result in a use-after-free. The kmod_dup_request_exists_wait() function may need to hold a valid reference to a kmod_dup_req instance across a blocking wait until the corresponding modprobe command completes. This makes it unsuitable for RCU. Fix the issue by changing the lifecycle management of kmod_dup_req to use reference counting. | ||||
| CVE-2026-90260 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 7.1 High |
| In the Linux kernel, the following vulnerability has been resolved: btrfs: zoned: don't clobber the extent buffer when zeroing it out On a zoned filesystem a freed-but-still-dirty tree block is written out as zeros (EXTENT_BUFFER_ZONED_ZEROOUT) only to keep the zone write pointer advancing. btree_csum_one_bio() implemented this by memzeroing the extent buffer's own folios before submission. That destroys the in-memory buffer while it may still be referenced. In particular btrfs_free_tree_block() can run on it afterwards and reads the header to add a delayed reference; once the header has been zeroed it frees bytenr 0 and corrupts the extent tree (the btrfs_header_bytenr(buf) != 0 ASSERT in btrfs_free_tree_block(), or an "unable to find ref" abort). It is flaky and reproduces under fsstress, e.g. generic/461 and generic/013. Write the zeros to disk from the shared zero page instead and leave the extent buffer content untouched, so any later reference - including the delayed reference from btrfs_free_tree_block() - still sees a valid header. end_bbio_meta_write() now clears writeback on the buffer's own folios, as the bio no longer carries them. | ||||
| CVE-2026-90256 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: Bluetooth: L2CAP: use proto_lock for l2cap_data to fix l2cap_disconn_ind hci_conn::l2cap_data is accessed without locks in l2cap_disconn_ind via hci_conn_timeout (disc_work) -> hci_proto_disconn_ind -> l2cap_disconn_ind. This is UAF if the l2cap_conn is deleted concurrently. disc_work is disabled sync in hci_conn_del(), so we cannot take hci_dev_lock in disc_work. Fix by using proto_lock to guard l2cap_data, in addition to hdev->lock which is held in other access paths. | ||||
| CVE-2026-90240 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: iommu/vt-d: Flush context cache with correct SID when tearing down aliases domain_context_clear_one() and device_pasid_table_teardown() are both invoked once per DMA alias of a device. Each function locates the context entry using the bus/devfn pair provided by the pci_for_each_dma_alias() callback, then calls intel_context_flush_no_pasid(), which constructs a device-selective context-cache invalidation from info->bus and info->devfn (that is, always the requester ID of the device itself). As a result, for every alias other than the device’s own RID, the context entry that was just cleared in memory is never invalidated in the context cache. Hardware may continue using that stale cached entry. In the scalable-mode teardown path, intel_pasid_free_table() can then free the PASID directory still referenced by that stale entry, allowing the IOMMU to walk freed memory. Fix this by passing the source ID of the entry being torn down to intel_context_flush_no_pasid(), instead of deriving it from @info. | ||||
| CVE-2026-90231 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 8.4 High |
| In the Linux kernel, the following vulnerability has been resolved: apparmor: fix unconfined user namespace restriction forced stack If a task is already confined by a stack the unprivileged transition restriction on unconfined is not correctly, applied. This results in an escape if two transitions through an unconfined profile can be executed. Fix this by pushing the check into the per profile label build. The check will always be done against unconfined and result in a stack of just the unconfined component when necessary. | ||||
| CVE-2026-90217 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: bpf: Compare iterator types during state pruning An iterator stack slot can be MEM_RCU or PTR_UNTRUSTED. These states must not be equal, or the verifier can prune an unsafe path. Compare the pointer type for STACK_ITER slots. | ||||
| CVE-2026-90177 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: bpf: Check pointer type for all atomic RMW paths Atomic RMW verification records an instruction pointer type only when the current destination is PTR_TO_ARENA. A second path can therefore reach the same instruction with an ordinary pointer without comparing it against the saved arena type. The post-verification fixup uses the saved type to rewrite the instruction to BPF_PROBE_ATOMIC for every path. Record the actual destination type for all atomic RMW paths so the existing mismatch check rejects incompatible uses of one instruction. | ||||
| CVE-2026-90154 | 1 Linux | 1 Linux Kernel | 2026-10-21 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: ksmbd: scope session state changes to bound connections ksmbd_all_conn_set_status() treats every connection whose transient binding flag is set as belonging to the target SessionId. A logoff or session replacement can consequently move an unrelated connection to NEED_RECONNECT or NEED_SETUP. Pass the target session itself and select connections using either the connection-local session xarray or the session's permanent channel list. Use the same association test while waiting for requests to drain. Serialize session-wide status changes under request_lock and do not overwrite EXITING or RELEASING. Protect the shutdown transition with the same lock so a concurrent session update cannot revive a closing connection. | ||||
| CVE-2026-90144 | 1 Linux | 1 Linux Kernel | 2026-10-21 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: dpll: fix NULL deref in dpll_device_ops() during teardown race When the last owner of a dpll device unregisters while a foreign driver still holds a pin on it via dpll_pin_on_pin_register(), the dpll object stays alive with an empty registration list. A pin notification queued before the unregister (e.g. ice reacting to zl3073x_i2c removal) then walks pin->dpll_refs into dpll_device_ops(), which trips the WARN_ON and dereferences the missing registration. dpll_lock cannot help because the notification work was queued before the unregistering driver took the lock. Treat the empty registration list as a legitimate transient state. Make dpll_priv() and dpll_device_ops() return NULL in that case and make every pin netlink path that resolves a device from a pin skip such dplls. dpll_cmd_pin_get_one() picks a ref with a live registration and returns -ENODEV when there is none, the pin dumpit skips such a pin instead of aborting the dump, dpll_msg_add_pin_dplls() and the frequency, esync, reference sync and phase adjust set paths skip dead refs, and dpll_pin_parent_device_set() validates the parent with dpll_device_get_by_id(). dpll_pin_register() is the last caller that dereferenced the device ops without a check, so move its frequency monitor validation under dpll_lock and tolerate a missing registration there as well. The empty registration list is equivalent to a cleared DPLL_REGISTERED mark, both transitions happen under dpll_lock in dpll_device_register() and dpll_device_unregister(). A pin notification for a pin whose dplls are all gone is now dropped with -ENODEV instead of crashing, all callers in the core ignore that return value. WARNING: drivers/dpll/dpll_core.c:1092 at dpll_device_ops+0x24/0x40, CPU#83: kworker/u576:3/23471 Modules linked in: ... ice ... zl3073x_i2c(-) ... zl3073x ... Workqueue: ice_dpll_wq ice_dpll_pin_notify_work [ice] RIP: 0010:dpll_device_ops+0x24/0x40 Call Trace: <TASK> dpll_cmd_pin_get_one+0x336/0x520 dpll_pin_event_send+0x82/0x140 dpll_pin_on_pin_unregister+0xbb/0x160 ice_dpll_pin_notify_work+0x1bc/0x1f0 [ice] process_one_work+0x19e/0x370 worker_thread+0x1a6/0x310 kthread+0xe4/0x120 ret_from_fork+0x1a1/0x270 ret_from_fork_asm+0x1a/0x30 </TASK> ---[ end trace 0000000000000000 ]--- BUG: kernel NULL pointer dereference, address: 0000000000000010 #PF: supervisor read access in kernel mode #PF: error_code(0x0000) - not-present page | ||||
| CVE-2026-90142 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: virtio_net: Fix resize of the RX ring When a AF_XDP socket is attached, the virtnet_rx_resize should resize the rq->xsk_buffs XSK buffer array. Otherwise, when the size grows, the virtnet_rx_resume() causes a write past the end of the array. This is easily reproducable with ethtool -G ens3 rx 32 ./xdpsock -i eth0 -q 0 -r -z & ethtool -G eth0 rx 256 | ||||
| CVE-2026-90086 | 1 Linux | 1 Linux Kernel | 2026-10-21 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: xsk: honor XDP_TX_METADATA in zero-copy path The zero-copy path reads TX metadata whenever the UMEM has metadata space, even if the descriptor does not set XDP_TX_METADATA. Pass descriptor options through the metadata helpers and ignore metadata unless the option is set. This does not fix the existing per-WQE metadata handling for mlx5 MPWQEs. Only the descriptor that starts a session passes through xsk_tx_metadata_request() and configures offload state shared by the batch. Metadata on descriptors joining an open session is therefore not validated and does not configure its requested offloads. In addition, a non-NULL metadata pointer from such a descriptor is treated as a timestamp completion request even when XDP_TXMD_FLAGS_TIMESTAMP is not set, so its metadata union can be overwritten with an unrequested timestamp. Fixing mixed metadata states within one MPWQE requires a separate change. | ||||
| CVE-2026-90060 | 1 Linux | 1 Linux Kernel | 2026-10-21 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: ALSA: control: Don't add invalid kcontrols to LED layer The kcontrol LED state layer tries to track the all associated kcontrol elements with naive assumptions that they are readable. But one can create a write-only element that has no get callback (even a user element can do it), and this may lead to a NULL dereference at the call chain of snd_ctl_led_notify(), as found by syzkaller. For avoiding the Oops, add a sanity check of the kcontrol's info and get callbacks, and just skip the invalid kcontrols before assigning the kctl to the LED layer. | ||||
| CVE-2026-90042 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 9.8 Critical |
| In the Linux kernel, the following vulnerability has been resolved: ceph: properly decrypt filenames in vmalloc() buffers The fscrypt subsystem uses the scatterlist crypto API, inheriting its requirement that any buffers are in the linear mapping region. However, the messenger client uses kvmalloc() to create buffers for messages, which will occasionally place those buffers in the vmalloc() region when physical memory fragmentation doesn't permit a large enough kmalloc(). The various callers of ceph_fname_to_usr() directly pass (slices of) raw messages from the MDS without considering that the messages may be in vmalloc() buffers, resulting in oopses especially on non-x86 platforms (see 'Closes:' for more details and a reproducer). Make ceph_fname_to_usr() explicitly tolerant of vmalloc()-allocated fname->ctext, fname->name, and/or oname->name buffers, using `tname` (which, when non-null, must be a linear address; when null, is briefly allocated as necessary) as a bounce buffer to avoid passing any inappropriate addresses to fscrypt_fname_disk_to_usr(). Additionally change parse_reply_info_readdir() -- the only function to supply its own `tname` -- to follow the new "tname must never come from vmalloc()" rule by passing NULL when the message is not in the linear region. Though this causes a per-dentry kmalloc()+kfree(), this overhead exists only when processing the minority of messages that spill into vmalloc(). My (crude) testing puts this at only about 1 in 8,000 readdir messages. Still, if the overhead proves unreasonable in the future, it is easy enough to mitigate: a future change could allocate a bounce buffer in parse_reply_info_readdir() and use that as `tname` instead. | ||||
| CVE-2026-90036 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 9.8 Critical |
| In the Linux kernel, the following vulnerability has been resolved: NFSD: Prevent client use-after-free during blocked-lock reaping A bare lock owner -- its only remaining reference a blocked lock on nn->blocked_locks_lru -- holds a raw pointer to its nfs4_client but no reference keeping the client alive. When the per-net laundromat reaps such a lock, freeing the nbl drops the owner reference held through flc_owner, and the final nfs4_put_stateowner() takes the client's cl_lock. Because the laundromat detaches the nbl first, __destroy_client() no longer finds it, so a concurrent force_expire_client() can free the client before nfs4_put_stateowner() runs, dereferencing cl_lock in freed memory. Pin the client with cl_rpc_users before dropping nn->blocked_locks_lock, and skip clients already expiring, whose blocked locks __destroy_client() frees while holding an owner reference. Take nn->client_lock outside nn->blocked_locks_lock. Every other site holds nn->blocked_locks_lock as a leaf, acquiring no further lock, so placing nn->client_lock outside it cannot form a lock-order cycle. | ||||
| CVE-2026-90030 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: usb: dwc3: clear forceRM when issuing EndTransfer The forceRM bit of the DEPCMD register controls the behavior of the EndTransfer command used to stop an active transfer. Older DWC3 programming guide revisions recommended setting forceRM=1 when issuing EndTransfer. Newer programming guide revisions recommend issuing EndTransfer with forceRM cleared. With forceRM=1 on DWC_usb31 v2.00a and v2.10a controllers, a transfer aborted through the ep_dequeue path was observed to remain active after EndTransfer completion. A subsequent StartTransfer issued on the same endpoint triggered writes associated with the aborted transfer. This resulted in an SMMU fault because the transfer buffer had already been unmapped during EndTransfer command-completion cleanup. Using forceRM=0 eliminates the issue. Although older DWC3 programming guide revisions recommended setting forceRM=1, no issues are known from using forceRM=0. Clear forceRM when issuing EndTransfer to provide consistent EndTransfer behavior and align with newer programming guide recommendations. | ||||
| CVE-2026-89929 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: KVM: nVM: Ensure INVVPID is emulated on the correct physical CPU When emulating INVVPID, KVM executes INVVPID on the physical CPU using vpid02 (instead of the L1 assigned VPID), after doing some validations on the operands. However, it is possible that the physical CPU KVM executes INVVPID on is different from the CPU L2 is running on. For example, in the following scenario: - L2 runs on CPU #1 and exits to L1 (vmx->nested.vmcs02.cpu=1) - L1 migrates to CPU #2 and executes INVVPID - KVM executes INVVPID on CPU #2 - L1 migrates back to CPU #1 and runs L2 (vmx->nested.vmcs02.cpu=1) The TLB entries on CPU #1 are never invalidated, because INVVPID was executed on CPU #2, and vmcs02 never ran on a different pCPU (i.e. vmx_vcpu_load_vmcs() will *not* request KVM_REQ_TLB_FLUSH). Ensure that INVVPID is being executed on the same pCPU that L2 last ran on, and if not, fallback to clearing last_vpid=0 to trigger a full VPID flush on the next nested VM-Enter (as KVM will detect L1 using a different VPID for L2). If L2 ends up running on a different pCPU, KVM will flush the TLB anyway through vmx_vcpu_load_vmcs(). | ||||
| CVE-2026-89913 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: KVM: arm64: vgic-v3: take an LPI reference in vgic_v3_save_pending_tables vgic_v3_save_pending_tables() iterates dist->lpi_xa using xa_for_each() and dereferences the returned struct vgic_irq in the loop body without holding a reference on the LPI. The xarray iterator only provides temporary RCU coverage while looking up the current entry. That is not sufficient for this loop body, which reads fields from struct vgic_irq and performs guest memory accesses before the iteration completes. A concurrent path can trigger this race: the irqfd cached injection path (vgic_its_inject_cached_translation) obtains a transient LPI reference via vgic_its_check_cache() without holding kvm->lock, vcpu->mutex, config_lock, or its_lock. If guest ITS DISCARD then drops the cache and ITE references under its_lock, the transient inject reference may become the final one. When vgic_put_irq() drops it, the LPI is erased from lpi_xa and freed via kfree_rcu(). Meanwhile, vgic_v3_save_pending_tables() may still hold a stale pointer obtained from the xarray iterator and dereference it after the RCU grace period completes. Fix this by re-fetching each iterated LPI via vgic_get_irq(), which takes a stable reference, and dropping it with vgic_put_irq() on all paths. This matches the pattern already used by other lpi_xa iterators in the vgic ITS code. | ||||
| CVE-2026-89906 | 1 Linux | 1 Linux Kernel | 2026-10-21 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: LoongArch: BPF: Refactor jump offset calculation in tail call The old macro-based jmp_offset calculation derives the jump distance from a stale prior-pass code stride, which can lead to wrong branch offsets and soft lockups under extra JIT passes. Fix this by calculating the offset directly on the absolute target: "ctx->offset[insn + 1] - ctx->idx". To avoid a false 16-bit range check abort during size estimation, add a "ctx->image == NULL" guard to inject a safe dummy offset. | ||||
| CVE-2026-89827 | 1 Linux | 1 Linux Kernel | 2026-10-21 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: drm/amdgpu: avoid force-completing uninitialized UVD rings uvd_v7_0_sw_init() does not initialize the UVD decode ring for an SR-IOV VF. However, amdgpu_uvd_resume() unconditionally force-completes the decode ring when restoring its fence sequence. Skip fence completion when the fence driver is not initialized. | ||||
| CVE-2026-89812 | 1 Linux | 1 Linux Kernel | 2026-10-21 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: drm/amdgpu: force complete the MES ring fences on reset The MES scheduler ring has no drm scheduler (no_scheduler = true), so it is skipped by the force-completion loop in amdgpu_device_pre_asic_reset(). It uses a polling fence whose hw value lives in wb (GTT) memory and survives a MODE1 reset, while fence_drv.sync_seq keeps advancing for every packet. When the reset is triggered because MES itself stopped responding, the timed-out packets advance sync_seq past the last hw fence value MES wrote. After resume the first MES submission polls forever on a seq that is never written back, failing the resume and wedging the box on a second reset: amdgpu: MES ring buffer is full. amdgpu: *ERROR* ring gfx_0.0.0 test failed (-110) amdgpu: resume of IP block <gfx_v11_0> failed -110 amdgpu: GPU reset end with ret = -110 Force complete the MES scheduler ring fences together with the scheduler rings so their hw fence is realigned to sync_seq. v2: cover all XCCs (one scheduler ring each), not just mes.ring[0]. | ||||