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| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-53367 | 1 Linux | 1 Linux Kernel | 2026-07-19 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: selinux: fix avdcache auditing The per-task avdcache was incorrectly saving and reusing the audited vector computed by avc_audit_required() rather than recomputing based on the currently requested permissions and distinguishing the denied versus allowed cases. As a result, some permission checks were not being audited, e.g. directory write checks after a previously cached directory search check. [PM: line wrap tweaks] | ||||
| CVE-2026-53689 | 1 Sahlberg | 1 Libnfs | 2026-07-19 | 7.1 High |
| libnfs through 6.0.2 before 55c18ea does not validate a string size, leading to an integer overflow during a connection to a crafted NFS server. This occurs in libnfs_zdr_string in lib/libnfs-zdr.c. | ||||
| CVE-2026-16154 | 1 Sourcecodester | 1 Class And Exam Timetabling System | 2026-07-18 | 7.3 High |
| A vulnerability was determined in SourceCodester Class and Exam Timetabling System 1.0/1.php. Affected by this vulnerability is an unknown functionality of the file /edit_room1.php. Executing a manipulation of the argument ID can lead to sql injection. The attack may be performed from remote. The exploit has been publicly disclosed and may be utilized. | ||||
| CVE-2026-16130 | 1 Nearai | 1 Ironclaw | 2026-07-18 | 4.4 Medium |
| A vulnerability was identified in nearai ironclaw up to 0.29.1. The affected element is the function validate_path of the file src/tools/builtin/path_utils.rs of the component write_file. The manipulation leads to link following. Local access is required to approach this attack. The exploit is publicly available and might be used. The identifier of the patch is 369ff3d240cf3c0787b50e1e9f182e1a06c71255. It is recommended to apply a patch to fix this issue. | ||||
| CVE-2026-53226 | 1 Linux | 1 Linux Kernel | 2026-07-18 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: gpio: rockchip: fix generic IRQ chip leak on remove The driver allocates domain generic chips using irq_alloc_domain_generic_chips() during probe. However, on driver remove/teardown, the generic chips are not automatically freed when the IRQ domain is removed because the domain flags do not include IRQ_DOMAIN_FLAG_DESTROY_GC. This causes both the domain generic chips structure and the associated generic chips to be leaked. Additionally, the generic chips remain on the global gc_list and may later be visited by generic IRQ chip suspend, resume, or shutdown callbacks after the GPIO bank has been removed, potentially resulting in a use-after-free and kernel crash. Fix the resource leak by explicitly calling irq_domain_remove_generic_chips() before removing the IRQ domain in rockchip_gpio_remove(). | ||||
| CVE-2026-53027 | 1 Linux | 1 Linux Kernel | 2026-07-18 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: fs/ntfs3: fix missing run load for vcn0 in attr_data_get_block_locked() When a compressed or sparse attribute has its clusters frame-aligned, vcn is rounded down to the frame start using cmask, which can result in vcn != vcn0. In this case, vcn and vcn0 may reside in different attribute segments. The code already handles the case where vcn is in a different segment by loading its runs before allocation. However, it fails to load runs for vcn0 when vcn0 resides in a different segment than vcn. This causes run_lookup_entry() to return SPARSE_LCN for vcn0 since its segment was never loaded into the in-memory run list, triggering the WARN_ON(1). Fix this by adding a missing check for vcn0 after the existing vcn segment check. If vcn0 falls outside the current segment range [svcn, evcn1), find and load the attribute segment containing vcn0 before performing the run lookup. The following scenario triggers the bug: attr_data_get_block_locked() vcn = vcn0 & cmask <- vcn != vcn0 after frame alignment load runs for vcn segment <- vcn0 segment not loaded! attr_allocate_clusters() <- allocation succeeds run_lookup_entry(vcn0) <- vcn0 not in run -> SPARSE_LCN WARN_ON(1) <- bug fires here! | ||||
| CVE-2026-46093 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: mm/vmalloc: take vmap_purge_lock in shrinker decay_va_pool_node() can be invoked concurrently from two paths: __purge_vmap_area_lazy() when pools are being purged, and the shrinker via vmap_node_shrink_scan(). However, decay_va_pool_node() is not safe to run concurrently, and the shrinker path currently lacks serialization, leading to races and possible leaks. Protect decay_va_pool_node() by taking vmap_purge_lock in the shrinker path to ensure serialization with purge users. | ||||
| CVE-2026-45945 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: iommu/vt-d: Fix race condition during PASID entry replacement The Intel VT-d PASID table entry is 512 bits (64 bytes). When replacing an active PASID entry (e.g., during domain replacement), the current implementation calculates a new entry on the stack and copies it to the table using a single structure assignment. struct pasid_entry *pte, new_pte; pte = intel_pasid_get_entry(dev, pasid); pasid_pte_config_first_level(iommu, &new_pte, ...); *pte = new_pte; Because the hardware may fetch the 512-bit PASID entry in multiple 128-bit chunks, updating the entire entry while it is active (Present bit set) risks a "torn" read. In this scenario, the IOMMU hardware could observe an inconsistent state — partially new data and partially old data — leading to unpredictable behavior or spurious faults. Fix this by removing the unsafe "replace" helpers and following the "clear-then-update" flow, which ensures the Present bit is cleared and the required invalidation handshake is completed before the new configuration is applied. | ||||
| CVE-2025-21807 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: block: fix queue freeze vs limits lock order in sysfs store methods queue_attr_store() always freezes a device queue before calling the attribute store operation. For attributes that control queue limits, the store operation will also lock the queue limits with a call to queue_limits_start_update(). However, some drivers (e.g. SCSI sd) may need to issue commands to a device to obtain limit values from the hardware with the queue limits locked. This creates a potential ABBA deadlock situation if a user attempts to modify a limit (thus freezing the device queue) while the device driver starts a revalidation of the device queue limits. Avoid such deadlock by not freezing the queue before calling the ->store_limit() method in struct queue_sysfs_entry and instead use the queue_limits_commit_update_frozen helper to freeze the queue after taking the limits lock. This also removes taking the sysfs lock for the store_limit method as it doesn't protect anything here, but creates even more nesting. Hopefully it will go away from the actual sysfs methods entirely soon. (commit log adapted from a similar patch from Damien Le Moal) | ||||
| CVE-2025-71397 | 2026-07-18 | N/A | ||
| SurrealDB before 2.0.5, 2.1.x before 2.1.5, and 2.2.x before 2.2.2 allows authenticated users with OWNER or EDITOR permissions (at the root, namespace, or database level) to define custom database functions via DEFINE FUNCTION using nested FOR loops. Although a single loop's iteration count is constrained, nesting multiple loops (e.g., each with 1,000,000 iterations) is not, so an attacker can execute a function that consumes all server CPU time. Configured timeouts do not stop the execution, rendering the server unresponsive to other queries and connections until it is manually restarted. | ||||
| CVE-2024-58357 | 2026-07-18 | 6.5 Medium | ||
| SurrealDB versions before 2.1.0 contain an uncaught exception vulnerability in the rand::time() function that panics when unwrap is called on a None result from timestamp_opt. Authorized clients can repeatedly invoke rand::time() to reliably trigger server panics and cause denial of service. | ||||
| CVE-2026-16158 | 2026-07-18 | 8.7 High | ||
| Impact: @fastify/reply-from versions from 8.3.1 up to but not including 12.6.4 build the internal URL cache key by concatenating the destination and source path without a delimiter. Different destination and source pairs can therefore produce the same key while resolving to different upstream URLs. When getUpstream selects an upstream from request data, a URL cached for one upstream can be reused for a request intended for another upstream, causing cross-upstream data access and modification. The default configuration is affected. Setting disableCache to true prevents the behavior. Patches: upgrade to @fastify/reply-from 12.6.4. Workarounds: pass disableCache: true when registering the plugin. | ||||
| CVE-2026-47869 | 2026-07-18 | 8.7 High | ||
| VMware Avi Load Balancer contains a remote code execution vulnerability. A malicious authenticated user with network access may be able to inject and execute code. Affected versions: 32.1.1 (fixed in 32.1.2) 31.1.1 through 31.2.2 (fixed in 31.2.2-2p3) 30.1.1 through 30.2.6 (fixed in 30.2.7) 22.1.1 through 22.1.7 (fixed in 30.2.7) | ||||
| CVE-2026-47868 | 2026-07-18 | 7.8 High | ||
| VMware Avi Load Balancer contains a local privilege escalation vulnerability. A malicious user with local access may be able to escalate their privileges to run code as root. Affected versions: 32.1.1 (fixed in 32.1.2) 31.1.1 through 31.2.2 (fixed in 31.2.2-2p3) 30.1.1 through 30.2.6 (fixed in 30.2.7) 22.1.1 through 22.1.7 (fixed in 30.2.7) | ||||
| CVE-2026-53366 | 2 Linux, Redhat | 3 Linux Kernel, Enterprise Linux, Enterprise Linux Eus | 2026-07-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: ipv4: account for fraggap on the paged allocation path In __ip_append_data(), when the paged-allocation branch is taken, alloclen and pagedlen are computed as alloclen = fragheaderlen + transhdrlen; pagedlen = datalen - transhdrlen; datalen already includes fraggap, but the fraggap bytes carried over from the previous skb are copied into the new skb's linear area at offset transhdrlen by the subsequent skb_copy_and_csum_bits(). The linear area is therefore undersized by fraggap bytes while pagedlen is overstated by the same amount. The non-paged branch sets alloclen to fraglen, which already accounts for fraggap because datalen does. Bring the paged branch in line by adding fraggap to alloclen and subtracting it from pagedlen. After this adjustment, copy no longer collapses to -fraggap on the paged path, so remove the stale comment describing that old arithmetic. | ||||
| CVE-2026-53363 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 9.8 Critical |
| In the Linux kernel, the following vulnerability has been resolved: xfrm: iptfs: preserve shared-frag marker in iptfs_consume_frags() iptfs_consume_frags() transfers paged fragments from one socket buffer to another but fails to propagate the SKBFL_SHARED_FRAG flag. This is the same class of bug that was fixed in skb_try_coalesce() for CVE-2026-46300: when fragments backed by read-only page-cache pages are merged, the marker indicating their shared nature must be preserved so that ESP can decide correctly whether in-place encryption is safe. Apply the same two-line fix used in skb_try_coalesce() to iptfs_consume_frags(). | ||||
| CVE-2026-53362 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: ipv6: account for fraggap on the paged allocation path In __ip6_append_data(), when the paged-allocation branch is taken (MSG_MORE / NETIF_F_SG / large fraglen), alloclen and pagedlen are computed as alloclen = fragheaderlen + transhdrlen; pagedlen = datalen - transhdrlen; datalen already includes fraggap (datalen = length + fraggap). When fraggap is non-zero, this is not the first skb and transhdrlen is zero. The fraggap bytes carried over from the previous skb are copied just past the fragment headers in the new skb's linear area. The linear area is therefore undersized by fraggap bytes while pagedlen is overstated by the same amount, and the copy writes past skb->end into the trailing skb_shared_info. An unprivileged user can trigger this via a UDPv6 socket using MSG_MORE together with MSG_SPLICE_PAGES. The bad accounting was introduced by commit 773ba4fe9104 ("ipv6: avoid partial copy for zc"). Before commit ce650a166335 ("udp6: Fix __ip6_append_data()'s handling of MSG_SPLICE_PAGES"), the negative copy value caused -EINVAL to be returned. That later commit allowed MSG_SPLICE_PAGES to proceed in this case, making the corruption triggerable. The non-paged branch sets alloclen to fraglen, which already accounts for fraggap because datalen does. Bring the paged branch in line by adding fraggap to alloclen and subtracting it from pagedlen. After this adjustment, copy no longer collapses to -fraggap on the paged path, so remove the stale comment describing that old arithmetic. Since a negative copy is no longer expected for a valid MSG_SPLICE_PAGES case, remove the MSG_SPLICE_PAGES exception from the negative copy check. | ||||
| CVE-2026-53361 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 7.1 High |
| In the Linux kernel, the following vulnerability has been resolved: af_unix: Set gc_in_progress to true in unix_gc(). Igor Ushakov reported that unix_gc() could run with gc_in_progress being false if the work is scheduled while running: Thread 1 Thread 2 Thread 3 -------- -------- -------- unix_schedule_gc() unix_schedule_gc() `- if (!gc_in_progress) `- if (!gc_in_progress) |- gc_in_progress = true | `- queue_work() | unix_gc() <----------------/ | | |- gc_in_progress = true ... `- queue_work() | | `- gc_in_progress = false | | unix_gc() <---------------------------------------------' | ... /* gc_in_progress == false */ | `- gc_in_progress = false unix_peek_fpl() relies on gc_in_progress not to confuse GC by MSG_PEEK. Let's set gc_in_progress to true in unix_gc(). | ||||
| CVE-2026-53360 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: KVM: SEV: Require in-GHCB scratch area if GHCB v2+ is in use As per the GHCB spec, when using GHCB v2+ require the software scratch area to reside in the GHCB's shared buffer. Note, things like Page State Change (PSC) requests _rely_ on this behavior, as the guest can't provide a length when making the request, i.e. the size of the guest payload is bounded by the size of the shared buffer. Failure to force usage of the GHCB, and a slew of other flaws, lets a malicious SNP guest corrupt host kernel heap memory, and leak host heap layout information. setup_vmgexit_scratch() allocates a buffer via kvzalloc(exit_info_2), where exit_info_2 is guest-controlled. With exit_info_2=24, this yields a 24-byte allocation in kmalloc-cg-32 (32-byte slab objects). The buffer holds an 8-byte psc_hdr followed by 8-byte psc_entry structs, so only entries[0] and entries[1] are in-bounds. snp_begin_psc() validates end_entry against VMGEXIT_PSC_MAX_COUNT (253) but NOT against the actual buffer size: idx_end = hdr->end_entry; if (idx_end >= VMGEXIT_PSC_MAX_COUNT) { // checks 253, not buffer snp_complete_psc(svm, ...); return 1; } for (idx = idx_start; idx <= idx_end; idx++) { entry_start = entries[idx]; // OOB when idx >= 2 The guest sets end_entry=10+, causing the host to iterate entries[2+] which are OOB into adjacent slab objects. For each OOB entry: - The host reads 8 bytes (OOB READ / info leak oracle) - If the data passes PSC validation, __snp_complete_one_psc() writes cur_page = 1 or 512 into the entry (OOB WRITE, sev.c:3806) - If validation fails, the error response reveals whether adjacent memory is zero vs non-zero (information disclosure to guest) The guest controls allocation size (exit_info_2), entry range (cur_entry/end_entry), and can fire unlimited VMGEXITs to repeatedly hit different slab positions. By exploiting the variety of bugs, a malicious SEV-SNP guest can: - OOB read adjacent kmalloc-cg-32 objects (heap layout disclosure) - OOB write cur_page bits into adjacent objects (heap corruption) - Trigger use-after-free conditions across VMGEXITs E.g. with KASAN enabled, a single insmod of the PoC guest module produces 73 KASAN reports: BUG: KASAN: slab-out-of-bounds in snp_begin_psc+0x126/0x890 Read of size 8 at addr ffff888219ffb5e0 by task qemu-system-x86/2199 BUG: KASAN: slab-out-of-bounds in snp_begin_psc+0x468/0x890 Write of size 8 at addr ffff888351566648 by task qemu-system-x86/2199 The buggy address belongs to the object at ffff888XXXXXXXXX which belongs to the cache kmalloc-cg-32 of size 32 The buggy address is located N bytes to the right of allocated 32-byte region [ffff888XXXXXXXXX, ffff888XXXXXXXXX) Breakdown: 62 slab-out-of-bounds (reads + writes past allocation) 7 slab-use-after-free 4 use-after-free All credit to Stan for the wonderful description and reproducer! [sean: write changelog] | ||||
| CVE-2026-53359 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: KVM: x86: Fix shadow paging use-after-free due to unexpected role Commit 0cb2af2ea66ad ("KVM: x86: Fix shadow paging use-after-free due to unexpected GFN") fixed a shadow paging mismatch between stored and computed GFNs; the bug could be triggered by changing a PDE mapping from outside the guest, and then deleting a memslot. The rmap_remove() call would miss entries created after the PDE change because the GFN of the leaf SPTE does not match the GFN of the struct kvm_mmu_page. A similar hole however remains if the modified PDE points to a non-leaf page. In this case the gfn can be made to match, but the role does not match: the original large 2MB page creates a kvm_mmu_page with direct=1, while the new 4KB needs a kvm_mmu_page with direct=0. However, kvm_mmu_get_child_sp() does not compare the role, and therefore reuses the page. The next step is installing a leaf (4KB) SPTE on the new path which records an rmap entry under the gfn resolved by the walk. But when that child is zapped its parent kvm_mmu_page has direct=1 and kvm_mmu_page_get_gfn() computes the gfn for the 4KB page as sp->gfn + index instead of using sp->shadowed_translation[] (or sp->gfns[] in older kernels). It therefore fails to remove the recorded entry. When the memslot is dropped the shadow page is freed but the rmap entry survives, as in the scenario that was already fixed. Code that later walks that gfn (dirty logging, MMU notifier invalidation, and so on) dereferences an sptep that lies in the freed page, causing the use-after-free. | ||||