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| CVE | CVSS | EPSS | Vendor, product | Description | Modified |
|---|---|---|---|---|---|
| CVE-2024-43384 | 8.0 high | 0.00% | phoenixcontact, fl_mguard_2102_firmware, fl_mguard_2105_firmware, fl_mguard_4102_pci_firmware | A low privileged remote attacker can gain the root password due to improper removal of sensitive information before storage or transfer. | Tue 27 Oct |
| CVE-2025-68713 | 8.0 high | 0.00% | no CPE yet | An issue was discovered in Rakuten Send Anywhere (File Transfer) for Android (com.estmob.android.sendanywhere) 23.2.9. The vulnerability allows untrusted applications (with no permissions) to force arbitrary file downloads into the app's scoped storage. The resulting files appear in the application's trusted Received interface. These conditions establish a vector for arbitrary code execution if the payload is an APK file, or a denial-of-service condition through resource exhaustion from oversized transfers. | 12 Oct |
| CVE-2026-105816 | 8.0 high | 0.00% | no CPE yet | Vault and Vault Enterprise did not consistently verify that stored plugin catalog entries reference binaries within the configured plugin directory. When Vault uses Shamir seals and has an external plugin directory configured, a privileged operator able to restore an Integrated Storage (Raft) snapshot may be able to execute arbitrary code on the Vault host. This vulnerability (CVE-2026-105816) is fixed in Vault Community Edition 2.1.2, and Vault Enterprise 2.1.2, 1.21.12, 1.20.17, and 1.19.23. | 9 Oct |
| CVE-2026-69290 | 7.8 high | 0.00% | microsoft, windows 10 version 1607, windows 10 version 1809, windows 10 version 21h2 | Stack-based buffer overflow in Windows Storage Spaces Controller allows an authorized attacker to elevate privileges locally. | 11 h ago |
| CVE-2026-68877 | 7.8 high | 0.00% | microsoft, windows 10 version 1607, windows 10 version 1809, windows 10 version 21h2 | Heap-based buffer overflow in Windows Storage Spaces Controller allows an authorized attacker to execute code locally. | 11 h ago |
| CVE-2026-68844 | 7.8 high | 0.00% | microsoft, windows 10 version 1607, windows 10 version 1809, windows 10 version 21h2 | Heap-based buffer overflow in Windows Storage Spaces Controller allows an authorized attacker to execute code locally. | 11 h ago |
| CVE-2026-72946 | 7.8 high | 0.00% | microsoft, windows 11 version 24h2, windows 11 version 25h2, windows 11 version 26h1 | Heap-based buffer overflow in Storage Port Driver allows an authorized attacker to elevate privileges locally. | 11 h ago |
| CVE-2026-71337 | 7.8 high | 0.00% | microsoft, windows 10 version 21h2, windows 10 version 22h2, windows 11 version 23h2 | Stack-based buffer overflow in Windows Storage Management Provider allows an authorized attacker to elevate privileges locally. | 11 h ago |
| CVE-2026-69389 | 7.8 high | 0.00% | microsoft, windows 10 version 1607, windows 10 version 1809, windows 10 version 21h2 | Heap-based buffer overflow in Windows Storage Management Provider allows an authorized attacker to elevate privileges locally. | 11 h ago |
| CVE-2026-65814 | 7.8 high | 0.00% | microsoft, windows 10 version 1607, windows 10 version 1809, windows 10 version 21h2 | Heap-based buffer overflow in Windows Storage Port Driver allows an authorized attacker to elevate privileges locally. | 16 h ago |
| CVE-2026-62695 | 7.8 high | 0.00% | microsoft, windows 11 version 23h2, windows 11 version 24h2, windows 11 version 25h2 | Heap-based buffer overflow in Windows Storage allows an authorized attacker to elevate privileges locally. | 16 h ago |
| CVE-2026-87706 | 7.8 high | 0.00% | microsoft, windows_10_1607, windows_10_1809, windows_10_21h2 | Heap-based buffer overflow in Windows Storage Spaces Controller allows an authorized attacker to elevate privileges locally. | Wed 28 Oct |
| CVE-2026-57088 | 7.8 high | 0.00% | microsoft, windows 10 version 1809, windows server 2019, windows server 2019 (server core installation) | Improper access control in Extensible Storage Engine (ESENT) allows an authorized attacker to elevate privileges locally. | Wed 28 Oct |
| CVE-2026-88143 | 7.8 high | 0.00% | microsoft, windows_10_1607, windows_10_1809, windows_10_21h2 | Heap-based buffer overflow in Windows Storage Spaces Controller allows an authorized attacker to elevate privileges locally. | Wed 28 Oct |
| CVE-2026-70238 | 7.8 high | 0.00% | microsoft, windows_10_1607, windows_10_1809, windows_10_21h2 | Heap-based buffer overflow in Windows Storage Spaces Controller allows an authorized attacker to elevate privileges locally. | Wed 28 Oct |
| CVE-2026-27907 | 7.8 high | 0.00% | microsoft, windows_11_23h2, windows_11_24h2, windows_11_25h2 | Integer underflow (wrap or wraparound) in Windows Storage Spaces Controller allows an authorized attacker to elevate privileges locally. | Mon 26 Oct |
| CVE-2026-32076 | 7.8 high | 0.00% | microsoft, windows_11_23h2, windows_11_24h2, windows_11_25h2 | Out-of-bounds read in Windows Storage Spaces Controller allows an authorized attacker to elevate privileges locally. | Mon 26 Oct |
| CVE-2026-98143 | 7.8 high | 0.00% | linux, linux_kernel | In the Linux kernel, the following vulnerability has been resolved: accel: ethosu: Don't read the U65 rounding mode as a storage mode Bits 15:14 of NPU_SET_{IFM,OFM}_PRECISION select the activation storage mode on U85 only. On U65 the same field holds the rounding mode, and the command stream parser has read it as a storage mode since the driver was added. That went unnoticed while unknown values fell through the switch, but now that they are rejected, every U65 command stream that asks for natural rounding (2) fails CMDSTREAM_BO_CREATE with -EINVAL. Mesa emits it for average pooling, concatenation, split, unpack, strided slice, LUT and argmax, which is 72 failures of the Teflon test suite on an i.MX93. Truncating rounding (1) is misread as well: it picks the two-tile address path and computes a bogus feature map size from tile bases the command stream never set. Read the field as a storage mode only on the hardware where it is one. | Mon 26 Oct |
| CVE-2026-40636 | 7.8 high | 0.00% | dell, elastic_cloud_storage, objectscale | Dell ECS versions 3.8.1.0 through 3.8.1.7 and Dell ObjectScale versions prior to 4.3.0.0, contains a use of hard-coded credentials vulnerability. An unauthenticated attacker with local access could potentially exploit this vulnerability, leading to filesystem access for attacker. | Mon 26 Oct |
| CVE-2026-99014 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: Bluetooth: hci_sync: Fix command skb lifetime during scan setup During PA sync scan setup, hci_le_set_ext_scan_param_sync() gets the address used for the PA_LINK lookup from hci_sent_cmd_data(). The returned pointer borrows storage from sent_cmd or req_skb, without holding a reference to either skb. The scan worker runs on req_workqueue while hci_cmd_work() runs on the separate device workqueue. After the scan worker loads sent_cmd, the command worker can free and replace it before hci_sent_cmd_data() dereferences the skb. The command payload can also be freed between returning from the helper and comparing the address. The connection lookup's RCU critical section does not protect the command skb. KASAN reported: BUG: KASAN: slab-use-after-free in hci_sent_cmd_data+0x27c/0x2f0 Workqueue: hci0 hci_cmd_sync_work Call Trace: hci_sent_cmd_data+0x27c/0x2f0 hci_le_set_scan_param_sync+0x43a/0x850 hci_passive_scan_sync+0xb09/0x1460 hci_update_passive_scan_sync+0x47c/0x6e0 hci_le_pa_create_sync+0x200/0xa70 hci_cmd_sync_work+0x13c/0x290 Allocated by task 95: skb_clone+0x13f/0x340 hci_cmd_work+0x2a9/0x7e0 Freed by task 95: kmem_cache_free+0xba/0x3a0 hci_cmd_work+0x29c/0x7e0 Use hdev->lock to serialize the address snapshot with sent_cmd replacement. Protect req_skb replacement and completion cleanup with the same lock because the helper falls back to that skb. Copy the address before releasing the lock and use the copy for the existing RCU-protected connection lookup. Release the mutex before sending or waiting for commands, preserving the lookup and completion ordering. | Sat 24 Oct |
| CVE-2026-98149 | 7.8 high | 0.00% | linux, linux_kernel | In the Linux kernel, the following vulnerability has been resolved: bpf: Fix percpu map update indexing with sparse CPU IDs Per-CPU array, hash, and cgroup storage map updates without BPF_F_CPU or BPF_F_ALL_CPUS use a value buffer whose per-CPU slots are packed in possible-CPU order. The buffer is sized as: round_up(value_size, 8) * num_possible_cpus() The update paths iterate over possible CPUs, but use the logical CPU ID to calculate the source offset: value + size * cpu This only works when possible CPU IDs are contiguous starting at zero. For example, with a possible CPU mask of 0,2-3, the buffer contains three slots corresponding to CPUs 0, 2, and 3. CPU2 is therefore expected to use slot 1 and CPU3 slot 2. Instead, the current code uses slots 2 and 3 respectively, causing incorrect per-CPU values and an out-of-bounds read from the update buffer for CPU3. The corresponding lookup paths already use a dense offset while iterating over possible CPUs. Do the same for the array, hash, and cgroup storage update paths, advancing the source offset once for each possible CPU. BPF_F_ALL_CPUS continues to use the same value for every CPU. | 21 Oct |
| CVE-2026-90321 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: ocfs2: validate inline xattrs during inode block validation Patch series "ocfs2: validate xattr entry bounds", v7. This series validates OCFS2 xattr entry name/value bounds when xattr metadata is read and validated, before getxattr() or listxattr() can walk out-of-range entry arrays or offsets from corrupted metadata. This patch (of 2): ocfs2_validate_inode_block() verifies a dinode before OCFS2 users walk metadata from it, but inline xattr metadata is still checked only in operation-specific consumers. The existing ibody lookup helper validates inline header placement and entry count, but inode block validation does not reject entry name/value bounds. Add a flat xattr entry validator and call it from inode block validation for inline xattrs. Keep the operation paths on their existing header/count lookup checks; the full entry bounds check now runs when the inode block is validated at read time. Reject corrupted inline xattr metadata before ocfs2_xattr_ibody_get() or listxattr() can walk past the inline storage. Validation reproduced this kernel report: BUG: KASAN: use-after-free in ocfs2_xattr_find_entry+0x5a/0x170 Read of size 2 at addr ffff8881242a2000 by task python3/529 Call Trace: dump_stack_lvl+0x66/0xa0 print_report+0xce/0x630 kasan_report+0xe0/0x110 ocfs2_xattr_find_entry+0x5a/0x170 ocfs2_xattr_get_nolock+0x20a/0x820 ocfs2_xattr_get+0x10c/0x1e0 __vfs_getxattr+0xe2/0x130 vfs_getxattr+0x185/0x1b0 | 21 Oct |
| CVE-2026-89832 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: f2fs: fix to clear dirty flag on folio in error path If node block is corrupted due to chksum mismatch or inconsistent footer info, it needs to drop clear flag of node folio, in order to persist inconsistent node data to storage. | 21 Oct |
| CVE-2026-68399 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: bpf: Fix UAF in sock clone early bailouts Similar to recent commit 9b51a6155d14 ("bpf,fork: wipe ->bpf_storage before bailouts that access it"), sk_clone() performs an initial shallow copy of the socket field ->sk_bpf_storage via sock_copy() for the cloned socket newsk. If sk_clone() bails out early (e.g. if sk_filter_charge() fails) prior to calling bpf_sk_storage_clone(), newsk->sk_bpf_storage still points to the parent socket's BPF local storage. When newsk is subsequently freed via sk_free(), the deallocation path (__sk_destruct() -> bpf_sk_storage_free()) destroys the parent socket's BPF local storage, leading to a use-after-free (UAF) on the parent socket. Fix this by resetting newsk->sk_bpf_storage to NULL immediately after sock_copy() in sk_clone(), and remove the now redundant initialization from bpf_sk_storage_clone(). | 21 Oct |
| CVE-2025-40199 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: page_pool: Fix PP_MAGIC_MASK to avoid crashing on some 32-bit arches Helge reported that the introduction of PP_MAGIC_MASK let to crashes on boot on his 32-bit parisc machine. The cause of this is the mask is set too wide, so the page_pool_page_is_pp() incurs false positives which crashes the machine. Just disabling the check in page_pool_is_pp() will lead to the page_pool code itself malfunctioning; so instead of doing this, this patch changes the define for PP_DMA_INDEX_BITS to avoid mistaking arbitrary kernel pointers for page_pool-tagged pages. The fix relies on the kernel pointers that alias with the pp_magic field always being above PAGE_OFFSET. With this assumption, we can use the lowest bit of the value of PAGE_OFFSET as the upper bound of the PP_DMA_INDEX_MASK, which should avoid the false positives. Because we cannot rely on PAGE_OFFSET always being a compile-time constant, nor on it always being >0, we fall back to disabling the dma_index storage when there are not enough bits available. This leaves us in the situation we were in before the patch in the Fixes tag, but only on a subset of architecture configurations. This seems to be the best we can do until the transition to page types in complete for page_pool pages. v2: - Make sure there's at least 8 bits available and that the PAGE_OFFSET bit calculation doesn't wrap | 19 Oct |
| CVE-2026-85872 | 7.8 high | 0.00% | no CPE yet | Use after free in Windows Storage VSP Driver allows an authorized attacker to elevate privileges locally. | 19 Oct |
| CVE-2026-31532 | 7.8 high | 0.00% | linux, linux_kernel | In the Linux kernel, the following vulnerability has been resolved: can: raw: fix ro->uniq use-after-free in raw_rcv() raw_release() unregisters raw CAN receive filters via can_rx_unregister(), but receiver deletion is deferred with call_rcu(). This leaves a window where raw_rcv() may still be running in an RCU read-side critical section after raw_release() frees ro->uniq, leading to a use-after-free of the percpu uniq storage. Move free_percpu(ro->uniq) out of raw_release() and into a raw-specific socket destructor. can_rx_unregister() takes an extra reference to the socket and only drops it from the RCU callback, so freeing uniq from sk_destruct ensures the percpu area is not released until the relevant callbacks have drained. [mkl: applied manually] | 19 Oct |
| CVE-2026-31403 | 7.8 high | 0.00% | linux, linux_kernel | In the Linux kernel, the following vulnerability has been resolved: NFSD: Hold net reference for the lifetime of /proc/fs/nfs/exports fd The /proc/fs/nfs/exports proc entry is created at module init and persists for the module's lifetime. exports_proc_open() captures the caller's current network namespace and stores its svc_export_cache in seq->private, but takes no reference on the namespace. If the namespace is subsequently torn down (e.g. container destruction after the opener does setns() to a different namespace), nfsd_net_exit() calls nfsd_export_shutdown() which frees the cache. Subsequent reads on the still-open fd dereference the freed cache_detail, walking a freed hash table. Hold a reference on the struct net for the lifetime of the open file descriptor. This prevents nfsd_net_exit() from running -- and thus prevents nfsd_export_shutdown() from freeing the cache -- while any exports fd is open. cache_detail already stores its net pointer (cd->net, set by cache_create_net()), so exports_release() can retrieve it without additional per-file storage. | 19 Oct |
| CVE-2026-98251 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: openvswitch: avoid reallocating confirmed conntrack labels ovs_ct_get_conn_labels() adds the labels extension when a conntrack entry does not have one. Confirmed conntracks can be read locklessly, so adding an extension may reallocate and free the extension block while another CPU accesses it. Only add the extension for unconfirmed conntracks. A confirmed conntrack without labels now fails the caller's label operation instead of reallocating its extension storage. | 19 Oct |
| CVE-2026-90069 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: crypto: acomp - allocate async request context when cloning ACOMP_REQUEST_ON_STACK() reserves only enough storage for the synchronous fallback. When an async implementation is selected, callers clone that stack request before retrying, but acomp_request_clone() currently copies only the stack-sized object. The clone therefore has no storage for the async provider request context, and providers such as QAT write past the allocation through acomp_request_ctx(). KASAN does report a slab OOB write. Allocate a zeroed clone large enough for the runtime acomp request size, copy only the bytes present in the source object, and preserve the existing fallback-on-allocation-failure behavior. Use the runtime reqsize because an implementation may adjust it during tfm initialization. | 19 Oct |
| CVE-2026-90047 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: drm/xe: Don't hand out the flat CCS storage as usable VRAM get_flat_ccs_offset() reads the base of the flat CCS storage from the hardware, scales it by the number of enabled L3 nodes, and rounds the result up to 128K. Everything below that offset is then handed to the VRAM allocator as usable memory. Rounding a limit that means "usable memory ends here" upwards publishes whatever lies between the real base and the rounded one as free memory, and that memory belongs to the compression hardware. The scaled value has no reason to be 128K aligned, and on a Battlemage G21 with 16 GiB it is not: flat CCS base: raw 0x3fafff800, rounded 0x3fb000000 so the last 2 KiB of page 0x3fafff000 is CCS storage, in the allocator's pool. Whatever is allocated there gets that tail overwritten by the compression hardware, which needs no page-table entry, no buffer object and no GPU submission to do it, and does it before userspace exists. On this machine a Mesa VM's level-3 page table landed on that page on every cold boot. It lost the entry covering the compositor's batch-buffer heap, so the compositor's first submission faulted fetching its batch and gdm restarted it forever: a black screen on an otherwise working machine. Restarting gdm cleared it because the next VM's page tables were allocated somewhere else. Round down instead, to the page size the allocator works in. On this machine that excludes exactly one page. Reading the reserved page afterwards shows what had been writing it: [369] 0xcccc000000000000 [371] 0xcc77000000000000 [373] 0xcccc000000000000 [375] 0xcc77000000000000 compression metadata, two bytes per sixteen, sitting where the driver used to hand out memory. The assertion that should have caught this compares the offset against GSMBASE - ccs_size for equality. That value is 128K aligned, so it agrees with the rounded-up offset precisely when the base is not aligned - the check cannot fail in the case it exists to catch, and is compiled out unless CONFIG_DRM_XE_DEBUG is set. Replace it with one that can fail: CCS storage must not run into GSM. [ And this was a debug session from hell, enormously helped by an AI doing much of the grunt-work. I'd like to call it my tireless helper, but the AI several times stated flat out that this was impossible and unsolvable and that we should just write a report about it. I suspect those things have been trained by people who may not be quite as stubborn as I am. But while the AI was ready to give up several times, it did keep adding debug code and analyzing it faithfully when I pushed. So credit where credit is due and I let the AI write the commit message above. This is basically a one-liner fixing a bogus "round_up()" to a "round_down()", but there were 24 patches adding more and more debug information to this, and 18 kernel boot to finally narrow it down to this. - Linus ] | 19 Oct |
| CVE-2026-89579 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: bpf: Harden bloom filter sizing and indexing on 32-bit kernels bloom_map_alloc() has two 32-bit-specific problems when the computed bitmap reaches the U32_MAX fallback case. First, BITS_TO_BYTES(U32_MAX) is evaluated with 32-bit arithmetic. The addition performed by DIV_ROUND_UP wraps, so the map allocates only the fixed-size bloom filter object while keeping bitset_mask == U32_MAX. Subsequent updates can then write past the allocated object. Second, fixing only the allocation size is not sufficient. The bloom hash is a u32, but set_bit() takes a signed long bit number and x86 test_bit() eventually feeds the index to variable_test_bit(long, ...). On 32-bit kernels, hashes in [0x80000000, U32_MAX] therefore become negative bit offsets. x86 bt/bts with a memory operand interpret those offsets relative to the supplied base, so a map with bitset_mask == U32_MAX can read or write before bloom->bitset even after allocating the full 512 MiB bitmap. Keep the U32_MAX fallback, but split each hash into a word pointer and an in-word bit number before calling test_bit() or set_bit(). The bitops argument is then always in [0, BITS_PER_LONG - 1], while BIT_WORD(h) still selects the intended word in the full bitmap. Compute the bitset size from (u64)bitset_mask + 1 before passing the final size to bpf_map_area_alloc(). This fixes the original under-allocation and keeps the allocated storage consistent with the addressable bitset. Exploitation note: local privilege escalation is possible on a 32-bit x86 kernel using the under-allocation bug from a binary with CAP_BPF. | 19 Oct |
| CVE-2026-89559 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: libnvdimm/labels: Prevent integer overflow in __nd_label_validate() The on-media namespace index field nslot is a u32 read from the DIMM label storage area. __nd_label_validate() bounds it against the config area size, but sizeof_namespace_label() returns unsigned, so the product nslot * label_size is evaluated in 32-bit and wraps modulo 2^32 before the comparison. A crafted nslot passes the bound and is then used as the loop trip count in nd_label_data_init(), whose memset() walks off the end of the config_size buffer: an out-of-bounds write. The field is not trusted -- it comes from the medium, or from userspace via ND_CMD_SET_CONFIG_DATA. Evaluate the product in 64-bit so the bound check is exact; conforming labels are unaffected. The check was safe when introduced by commit 4a826c83db4e ("libnvdimm: namespace indices: read and validate"): it multiplied by sizeof(struct nd_namespace_label), a size_t, so on a 64-bit build the product did not wrap. Commit 564e871aa66f ("libnvdimm, label: add v1.2 nvdimm label definitions") narrowed it to 32 bits when the label size became a runtime value read via sizeof_namespace_label(). | 19 Oct |
| CVE-2026-89540 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: sunrpc: init gssp_lock before publishing proc entry create_use_gss_proxy_proc_entry() publishes /proc/net/rpc/use-gss-proxy via proc_create_data() before init_gssp_clnt() runs mutex_init() on sn->gssp_lock. Once the dentry is linked under proc_subdir_lock it is immediately reachable from userspace, so a write that lands in the window drives set_gssp_clnt() into mutex_lock() on a zero-initialized struct mutex. create_use_gss_proxy_proc_entry(net) proc_create_data("use-gss-proxy", ...) /* dentry live */ init_gssp_clnt(sn) mutex_init(&sn->gssp_lock) /* too late */ write_gssp() set_gssp_clnt(net) mutex_lock(&sn->gssp_lock) /* uninitialized */ gssp_rpc_create(...) sn->gssp_clnt = clnt mutex_unlock(&sn->gssp_lock) The window spans only the two statements between proc_create_data() returning and init_gssp_clnt(), so a writer reaches it only if the registering thread is preempted there while another task is already opening the freshly published file. register_pernet_subsys() runs in preemptible context under pernet_ops_rwsem, so that preemption is possible, and the window widens on auth_rpcgss module load, when the proc entry is created for every live net namespace whose tasks are already running. A writer that wins the race locks a zero-filled struct mutex. On CONFIG_DEBUG_MUTEXES the missing magic value trips a "lock used without init" splat; on a production kernel the fast path acquires the lock via CMPXCHG(owner, 0, current). In the latter case a second writer that arrives before init_gssp_clnt() re-zeroes owner can enter set_gssp_clnt() concurrently, shut down the first writer's clnt while it is still in use, and leak the loser's clnt. Fix by initializing sn->gssp_lock in sunrpc_init_net() so its lifetime matches the sunrpc_net it lives in. sn->gssp_clnt is already NULL from the kzalloc that backs net_generic storage, so the lazy helper is no longer needed; drop init_gssp_clnt(), its prototype, and the call from create_use_gss_proxy_proc_entry(). sunrpc.ko is a build-time dependency of auth_rpcgss.ko, so sunrpc_init_net() has always run on every netns before any auth_gss pernet init can publish the proc entry. | 19 Oct |
| CVE-2026-74666 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: packet: synchronize pressure clearing with ring reconfiguration packet_set_ring() updates the RX ring state under sk_receive_queue.lock, but used to publish the tpacket receive mode through po->prot_hook.func after releasing that lock. packet_poll() and packet_recvmsg() can then run the pressure clearing path after the ring has been cleared while still seeing tpacket_rcv, causing __packet_rcv_has_room() to dereference stale or NULL ring storage. Move the existing receive hook assignment into the same sk_receive_queue.lock section as the ring state update. Keep the assignment otherwise unchanged, including on TX ring reconfiguration, to avoid adding behavior changes that are not required for the fix. Serialize packet_recvmsg() pressure clearing with the same queue lock only after PACKET_SOCK_PRESSURE has been observed. If the flag is clear and the socket has moved away from tpacket_rcv, packet_set_ring() has already detached the socket and waited for synchronize_net(), so no new packet input can set the flag again. packet_poll() already holds sk_receive_queue.lock, so it uses the new unlocked helper directly. | 16 Oct |
| CVE-2026-74450 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: drm/amd/pm: fix pptable use-after-free amdgpu_dpm_get_pp_table() returns a pointer to a driver-owned power table after dropping adev->pm.mutex. The sysfs path then copies from that pointer. A concurrent pp_table write can replace and free the allocation during the copy, causing a use-after-free. Change the DPM interface to copy into caller-provided storage while the mutex is held. Keep the size-only query for attribute discovery without exposing the driver-owned pointer. (cherry picked from commit f6eed7acfd30099ef7baeb6ba45bb59daad80631) | 16 Oct |
| CVE-2026-74305 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: bpf: Tighten cgroup storage cookie checks for prog arrays The fix in commit abad3d0bad72 ("bpf: Fix oob access in cgroup local storage") is still incomplete. The prog-array compatibility check treats a program with no cgroup storage as compatible with any stored storage cookie. This allows a storage-less program to bridge a tail call chain between an entry program and a storage-using callee even though cgroup local storage at runtime still follows the caller's context, that is, A -> B(no storage) -> C(storage) path. Requiring exact cookie equality would break the legitimate case of a storage-less leaf program being tail called from a storage-using one. Instead, only accept a zero storage cookie if the program cannot perform tail calls itself. This keeps A -> B(no storage) working while rejecting the A -> B(no storage) -> C(storage) bridge. | 16 Oct |
| CVE-2026-72255 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: netfilter: nf_queue: pin bridge device while NFQUEUE holds fake dst The br_netfilter fake rtable is embedded in struct net_bridge and is attached to bridged packets with skb_dst_set_noref(). If such a packet is queued to NFQUEUE, __nf_queue() upgrades that fake dst with skb_dst_force(). At that point the queued skb can hold a real dst reference after bridge teardown has started. The problem is not that every bridged packet needs its own dst reference. The problem is that NFQUEUE can keep the bridge private fake dst alive after unregister begins. Fix this by keeping the bridge fake dst model unchanged and pinning the bridge master device only while the packet sits in NFQUEUE. Record the bridge device in nf_queue_entry when the queued skb carries a bridge fake dst, take a device reference for the queue lifetime, and drop it when the queue entry is freed. Also make sure queued entries are reaped when that bridge device goes down, and drop the redundant nf_bridge_info_exists() test from the fake dst detection. This keeps netdev_priv(br->dev) alive until verdict completion, so the embedded fake rtable and its metrics backing storage cannot be freed out from under dst_release(). It also avoids the constant refcount bump and avoids using ipv4-specific dst helpers for IPv6 bridge traffic. | 16 Oct |
| CVE-2026-72110 | 7.8 high | 0.00% | no CPE yet | In the Linux kernel, the following vulnerability has been resolved: bpf,fork: wipe ->bpf_storage before bailouts that access it Currently, copy_process() can bail out to free_task() before p->bpf_storage has been initialized, with this call graph (shown here for the !CONFIG_MEMCG case): copy_process dup_task_struct arch_dup_task_struct [copies the entire task_struct, including ->bpf_storage member] [RLIMIT_NPROC check fails] delayed_free_task free_task bpf_task_storage_free rcu_dereference(task->bpf_storage) bpf_local_storage_destroy In this case, the nascent task's ->bpf_storage member that bpf_local_storage_destroy() operates on is a plain copy of the parent's ->bpf_storage pointer, not a real initialized pointer. This leads to badness (kernel hangs, UAF). This is reachable as long as the process calling fork() has been inserted into a task storage map. | 16 Oct |
| CVE-2026-88100 | 7.8 high | 0.00% | microsoft, windows_11_24h2, windows_11_25h2, windows_11_26h1 | Use after free in Windows Storage Spaces Controller allows an authorized attacker to elevate privileges locally. | 16 Oct |
| CVE-2022-49990 | 7.8 high | 0.00% | linux, linux_kernel | In the Linux kernel, the following vulnerability has been resolved: s390: fix double free of GS and RI CBs on fork() failure The pointers for guarded storage and runtime instrumentation control blocks are stored in the thread_struct of the associated task. These pointers are initially copied on fork() via arch_dup_task_struct() and then cleared via copy_thread() before fork() returns. If fork() happens to fail after the initial task dup and before copy_thread(), the newly allocated task and associated thread_struct memory are freed via free_task() -> arch_release_task_struct(). This results in a double free of the guarded storage and runtime info structs because the fields in the failed task still refer to memory associated with the source task. This problem can manifest as a BUG_ON() in set_freepointer() (with CONFIG_SLAB_FREELIST_HARDENED enabled) or KASAN splat (if enabled) when running trinity syscall fuzz tests on s390x. To avoid this problem, clear the associated pointer fields in arch_dup_task_struct() immediately after the new task is copied. Note that the RI flag is still cleared in copy_thread() because it resides in thread stack memory and that is where stack info is copied. | 15 Oct |
| CVE-2026-31452 | 7.8 high | 0.00% | linux, linux_kernel | In the Linux kernel, the following vulnerability has been resolved: ext4: convert inline data to extents when truncate exceeds inline size Add a check in ext4_setattr() to convert files from inline data storage to extent-based storage when truncate() grows the file size beyond the inline capacity. This prevents the filesystem from entering an inconsistent state where the inline data flag is set but the file size exceeds what can be stored inline. Without this fix, the following sequence causes a kernel BUG_ON(): 1. Mount filesystem with inode that has inline flag set and small size 2. truncate(file, 50MB) - grows size but inline flag remains set 3. sendfile() attempts to write data 4. ext4_write_inline_data() hits BUG_ON(write_size > inline_capacity) The crash occurs because ext4_write_inline_data() expects inline storage to accommodate the write, but the actual inline capacity (~60 bytes for i_block + ~96 bytes for xattrs) is far smaller than the file size and write request. The fix checks if the new size from setattr exceeds the inode's actual inline capacity (EXT4_I(inode)->i_inline_size) and converts the file to extent-based storage before proceeding with the size change. This addresses the root cause by ensuring the inline data flag and file size remain consistent during truncate operations. | 15 Oct |
| CVE-2026-116243 | 7.7 high | — | pgadmin.org, pgadmin 4 | pgAdmin 4 runs pg_dump, pg_restore, pg_dumpall and psql from the binary path a user sets in their preferences. In server mode the binary path was refused only when it lay under the per-user storage directory (STORAGE_DIR), not under a SHARED_STORAGE directory, which ordinary users can upload files to. A user could therefore upload an executable to shared storage, point their binary path at it, and have pgAdmin run it as the operating-system account running pgAdmin. On POSIX, files created through pgAdmin are not executable, so this is exploitable where any file with an executable name can run, such as Windows server mode. The fix checks the binary path against every SHARED_STORAGE directory as well, after expanding $DIR, collapsing ".." and resolving symbolic links, compares directories in a way a different spelling on a case-insensitive filesystem cannot bypass, refuses a path containing a NUL, and enforces the check wherever binary paths are resolved, including for the PSQL tool. This issue affects pgAdmin 4: before 9.19. | 13 h ago |
| CVE-2026-13451 | 7.7 high | 0.00% | no CPE yet | A flaw was found in KServe. A namespace-scoped user with create/update permissions on InferenceService custom resources can exploit this vulnerability by providing a malicious `storageUri`. This Server-Side Request Forgery (SSRF) vulnerability allows the `storage-initializer` init container to issue arbitrary outbound HTTP/HTTPS requests from inside the cluster. This can lead to information disclosure, including credential theft for the node's Identity and Access Management (IAM) role or access to internal cluster services. | Wed 28 Oct |
| CVE-2026-47684 | 7.7 high | 0.00% | no CPE yet | Sync-in Server is a secure, open-source platform for file storage, sharing, collaboration, and syncing. Prior to version 2.3.0, the private IP blocklist regex used in the URL download feature does not match IPv4-mapped IPv6 addresses (e.g. ::ffff:127.0.0.1), allowing SSRF protection to be bypassed on dual-stack systems. Version 2.3.0 fixes the issue. | Sun 25 Oct |
| CVE-2026-54910 | 7.7 high | 0.00% | no CPE yet | FileBrowser Quantum is a free, self-hosted, web-based file manager. Prior to version 1.4.3-beta, the `subtitlesHandler` endpoint (`GET /api/media/subtitles`) accepts two user-controlled query parameters: `path` and `name`, both of which are used in filesystem operations without sanitization, creating two independent path traversal vectors. The primary vector is the `path` parameter: it is passed directly to `idx.GetRealPath()` without calling `SanitizeUserPath()`, allowing an attacker to escape the storage root and set `parentDir` to any directory on the host. No existing anchor file is required. The secondary vector is the `name` parameter: it is joined with `parentDir` via `filepath.Join(parentDir, name)` without stripping directory components, allowing traversal relative to any resolved `parentDir`. Any authenticated user (regardless of role or permissions) can exploit either vector to read any text file readable by the server process, including `/etc/passwd`, SSH keys, database credentials, and JWT signing keys. Version 1.4.3-beta patches the issue. | Sat 24 Oct |
| CVE-2026-105945 | 7.7 high | 0.00% | no CPE yet | The Pulsar Packages Management Service can be configured to store packages on the local filesystem of the broker by using the filesystem storage provider. Package names consist of a type, tenant, namespace, name and version. Authorization of package operations is based only on the tenant and namespace, while the storage location of a package is derived from all of these components. The version component of a package name was not validated, so it could contain URL-encoded path separators and parent directory references. The filesystem storage provider resolved such a version to a location belonging to a package in a different tenant or namespace. Because that location is inside the configured storage directory, the containment check that the filesystem storage provider performs in recent releases did not prevent the access. An authenticated user who has the packages permission on any namespace could use this to download, overwrite or delete packages stored in other tenants or namespaces for which the user has no permission. Packages overwritten or deleted in this way may be used by Pulsar Functions, Sources or Sinks, so the issue can affect the integrity and availability of these components. If authentication is disabled, the operations are available to any client that can reach the broker's admin REST API. This issue only affects deployments in which package management is enabled with the broker setting enablePackagesManagement and the filesystem storage provider (FileSystemPackagesStorageProvider) is configured with the setting packagesManagementStorageProvider. Package management is disabled by default, and the default storage provider, which stores packages in Apache BookKeeper, is not affected. This issue affects Apache Pulsar versions from 2.10.0 before 4.0.14 and from 4.1.0 before 4.2.5. - 4.0.x version users should upgrade to at least 4.0.14. - 4.1.x and 4.2.x version users should upgrade to at least 4.2.5. Users operating versions prior to those listed above should upgrade to the aforementioned patched versions or newer versions. The currently supported Apache Pulsar release lines are 4.0.x and 5.0.x. The supported versions schedule is available at https://pulsar.apache.org/contribute/release-policy/. | 23 Oct |
| CVE-2026-61411 | 7.7 high | 0.00% | dell, container_storage_modules | Dell Container Storage Modules, versions prior to 1.18.0, contain(s) an Insertion of Sensitive Information into Log File vulnerability. A low privileged attacker with remote access could potentially exploit this vulnerability, leading to Information disclosure. | 20 Oct |
| CVE-2025-13601 | 7.7 high | 0.00% | redhat, gnome, codeready_linux_builder, codeready_linux_builder_for_ibm_z_systems, codeready_linux_builder_for_power_little_endian | A heap-based buffer overflow problem was found in glib through an incorrect calculation of buffer size in the g_escape_uri_string() function. If the string to escape contains a very large number of unacceptable characters (which would need escaping), the calculation of the length of the escaped string could overflow, leading to a potential write off the end of the newly allocated string. | 18 Oct |
| CVE-2026-54457 | 7.7 high | 0.00% | no CPE yet | TensorZero is an open-source LLMOps platform that unifies an LLM gateway, observability, evaluation, optimization, and experimentation. Prior to 2026.6.0, the TensorZero Gateway /internal/object_storage endpoint accepts a caller-supplied JSON storage_path parameter that dynamically overrides the [object_storage] configuration. Selecting the filesystem storage type allows arbitrary files on the gateway filesystem to be read, including credential files. Selecting the s3_compatible storage type causes outbound object-storage requests to attacker-chosen internal or cloud-metadata endpoints. Exploitation requires access to the gateway, which can be authenticated or unauthenticated depending on deployment configuration. This issue is fixed in version 2026.6.0. | 14 Oct |
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EPSS scores: 2026-10-30. 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.