Contents
Recall basic Tree Terminologies 2
Describe Array and Linked Representation 3
Recall the concept of Binary Tree Creation 4
Draw the Binary Trees for the given number of Nodes 6
Explain the Concept of Strictly Binary Tree, Complete Binary Tree, and Full Binary Tree 7
Describe Binary Tree Traversal 7
Find the Inorder, Preorder, and Postorder Traversals of a given Binary Tree 7
Draw a Binary Tree for Arithmetic Expression 7
Define and Classify Threaded Binary Trees 7
Draw Threaded Binary Trees for various Tree Traversals 7
Write C functions for Inorder and Preorder Traversals in a Threaded Binary Tree 7
Convert a General Tree into a Binary Tree 7
Create a Binary Search Tree for the given elements 7
Describe Insertion and Deletion operations to be performed with BST 7
Define Complexities of Insertion into and Deletion from BST 7
Recall the Balancing methods of AVL Trees 7
Create AVL search tree for Numerical or Alphabetical Sequences 7
List Applications of Trees for the representation of Sets 7
Recall Heap and its Memory representation 7
Recall Heap Operations: Insert, Delete, Sort etc 7
Differentiate between MinHeap and MaxHeap 7
Create MinHeap/MaxHeap for the given elements and describe Heapify operation 7
Describe Applications of the Heap 7
Apply Huffman Algorithm and generate the Binary code for each element 7
Define and Classify mway Search Tree 7
Create B Tree for the given elements 7
Describe Insertion and Deletion operations to be performed with the BTree 7
Describe Operations to be performed with the B+ Tree 7
Define and Classify Tree
In computer science, a tree is a hierarchical data structure that represents a set of connected nodes. Each node in a tree can have zero or more child nodes, except for the root node, which has no parent. The nodes in a tree are connected by edges, which represent the relationships between the nodes.
Trees can be classified based on various properties and characteristics. Here are some common classifications of trees:
 Binary Tree:
 A binary tree is a tree in which each node has at most two children, known as the left child and the right child.
 Binary trees are commonly used for efficient searching, sorting, and traversal algorithms.
 Binary Search Tree (BST):
 A binary search tree is a binary tree in which the values of the nodes in the left subtree are less than the value of the parent node, and the values of the nodes in the right subtree are greater than the value of the parent node.
 BSTs are used for efficient searching, insertion, and deletion of elements in a sorted manner.
 AVL Tree:
 An AVL tree is a selfbalancing binary search tree in which the heights of the left and right subtrees of any node differ by at most one.
 AVL trees maintain balance to ensure efficient operations even with dynamic updates.
 BTree:
 A Btree is a selfbalancing search tree that can have more than two children per node and is designed to efficiently store large amounts of data on disk or secondary storage.
 Btrees are commonly used in databases and file systems.
 RedBlack Tree:
 A redblack tree is a selfbalancing binary search tree in which each node has an extra bit that represents its color (either red or black).
 Redblack trees provide efficient insertion, deletion, and search operations with guaranteed logarithmic time complexity.
 Trie (Prefix Tree):
 A trie is a treelike data structure used for efficient retrieval of keys or words from a large set of strings.
 Tries are commonly used in applications involving dictionary lookup, autocomplete, and spell checking.
 Nary Tree:
 An Nary tree is a tree in which each node can have any number of children, where N represents the maximum number of children for any node.
 Nary trees are used in various applications, including hierarchical file systems and organization structures.
These are just a few examples of tree classifications. Trees are versatile data structures and find applications in various domains, such as data storage, graph representation, hierarchical organization, and more. The choice of a specific tree structure depends on the requirements and characteristics of the problem at hand.
Recall basic Tree Terminologies
Here are some basic tree terminologies:
 Root: The root is the topmost node in a tree. It is the starting point of the tree and has no parent.
 Parent: A node in a tree that has one or more child nodes is called a parent node. It is located above its child nodes in the tree structure.
 Child: A node in a tree that is directly connected to a parent node is called a child node. Each parent node can have multiple child nodes.
 Sibling: Nodes that share the same parent node are called sibling nodes. They are at the same level in the tree and share the same parent.
 Leaf: A leaf node, also known as a terminal node or external node, is a node that has no children. It is located at the bottom level of the tree.
 Internal Node: An internal node is any node in a tree that has at least one child node. It is not a leaf node.
 Depth: The depth of a node in a tree is the number of edges from the root node to that particular node. The root node has a depth of 0.
 Height: The height of a tree is the maximum number of edges from the root node to any leaf node. It represents the longest path in the tree.
 Subtree: A subtree is a portion of a tree that consists of a node and all its descendants. It is a smaller tree within the main tree.
 Degree: The degree of a node in a tree is the number of children it has. For example, a binary tree has a maximum degree of 2.
 Parent Pointer: Some tree representations include a pointer from each node to its parent node. This allows easy navigation from child to parent.
These terminologies are commonly used when discussing tree structures and operations. Understanding these terms is essential for working with trees and implementing tree algorithms.
Describe Array and Linked Representation
 Array Representation of Binary Tree:
In the array representation of a binary tree, the binary tree is stored in a onedimensional array. The elements of the array represent the nodes of the binary tree. The array is typically implemented in a levelbylevel manner, where each level of the tree is represented sequentially in the array.
The array representation has the following properties:
 The root of the binary tree is stored at index 0 of the array.
 For any node at index i, its left child is stored at index 2i+1 and its right child is stored at index 2i+2.
 If a node does not have a left or right child, the corresponding index in the array is filled with a special value (e.g., 1 or NULL) to indicate the absence of a child.
The array representation is efficient in terms of memory usage, as it requires a continuous block of memory. However, it may lead to wasted space if the binary tree is sparse (i.e., has many missing nodes).
 Linked Representation of Binary Tree:
In the linked representation of a binary tree, each node of the binary tree is represented by a separate structure or object, known as a “node” or “tree node.” Each node contains a value and references to its left child and right child nodes.
The linked representation has the following properties:
 Each node object contains the value of the node and two pointers/references, one for the left child and one for the right child.
 The root of the binary tree is represented by a pointer/reference to the node at the top of the tree.
 The left child and right child pointers/references of a node are set to NULL if the corresponding child does not exist.
The linked representation is flexible and allows for efficient traversal and manipulation of the binary tree. It is especially useful when the binary tree is dynamic and its structure changes frequently. However, it requires additional memory space for storing the pointers/references.
Both the array and linked representations have their own advantages and disadvantages, and the choice between them depends on the specific requirements and constraints of the application.
Recall the concept of Binary Tree Creation
Binary tree creation refers to the process of constructing a binary tree by adding nodes and establishing the connections between them. There are various approaches to creating a binary tree, including recursive methods and iterative methods.
 Recursive Binary Tree Creation:
In the recursive approach, a binary tree is created by recursively creating the left and right subtrees of each node. The process involves the following steps:
 Start with an empty tree or a single root node.
 For each node, create its left subtree recursively by calling the same creation function with appropriate parameters.
 Create its right subtree recursively by calling the same creation function with appropriate parameters.
 Connect the left and right subtrees to the node.
 Repeat the process until all nodes of the binary tree are created.
 Iterative Binary Tree Creation:
In the iterative approach, a binary tree is created by traversing the input data and adding nodes one by one. The process involves the following steps:
 Start with an empty tree or a single root node.
 Read the input data or elements that need to be inserted into the tree.
 For each element, create a new node and assign the element as the value of the node.
 Determine the position of the new node in the tree by traversing the existing nodes and finding the appropriate location based on certain criteria (e.g., value comparison).
 Connect the new node to the appropriate parent node by updating the left or right child pointer of the parent node.
 Repeat the process for all elements in the input data.
The specific implementation details of binary tree creation may vary depending on the programming language and data structures used. However, the main idea is to systematically add nodes and establish the correct connections to form a binary tree structure.
Draw the Binary Trees for the given number of Nodes
The general formula to calculate the number of possible binary trees for a given number of nodes (n) is as follows:
Number of Binary Trees = Catalan Number (Cn)
The Catalan number (Cn) is a sequence of natural numbers that appear in various counting problems, including counting the number of possible binary trees. The formula to calculate the Catalan number is given by:
Cn = (2n)! / ((n + 1)! * n!) = C(2n,n)/(n+1)
Where “!” denotes the factorial operation.
Using this formula, you can calculate the number of possible binary trees for any given number of nodes (n). Note that the Catalan number grows rapidly as n increases, and it represents the total number of structurally distinct binary trees possible for that value of n.
For example, if n = 4, the number of possible binary trees would be:
C4 = (2 * 4)! / ((4 + 1)! * 4!) = 14
So, for 4 nodes, there are 14 possible binary trees.
Here are all possible binary trees for the given number of nodes:
 Binary Tree with 1 Node:
1
 Binary Tree with 2 Nodes:
1 1
/ \
2 2
 Binary Tree with 3 Nodes:
NUmber of possible Binary trees = 5 (Ignore node numbers)
1 1 1 1 1
/ \ / \ / \
2 3 2 2 2 2
/ \ \ /
3 3 3 3
Please note that these are just examples of binary trees with a specific number of nodes. There can be multiple valid binary tree configurations for each number of nodes, depending on the specific order of node insertion and the desired tree structure.
Explain the Concept of Strictly Binary Tree, Complete Binary Tree, and Full Binary Tree
 Strictly Binary Tree:
A strictly binary tree is a type of binary tree where each node has either 0 or 2 children. In other words, there are no nodes with only one child in a strictly binary tree. Every node in a strictly binary tree must have either 0 (leaf node) or 2 children. This property ensures that the tree is balanced and follows a specific structure.
 Complete Binary Tree:
A complete binary tree is a binary tree in which all levels, except possibly the last level, are completely filled, and all nodes are as far left as possible. In a complete binary tree, all nodes at the last level are leftaligned. This means that if there are any missing nodes in the last level, they will be towards the right side of the tree. Complete binary trees are commonly used in data structures like heaps and binary search trees.
 Full Binary Tree:
A full binary tree is a binary tree in which every node has either 0 or 2 children. In other words, every node in a full binary tree must have either 0 (leaf node) or 2 children. There are no nodes with only one child in a full binary tree. This property ensures that the tree is balanced and follows a specific structure.
Comparison:
 In a strictly binary tree, each node has either 0 or 2 children, while in a complete binary tree, all levels are completely filled except possibly the last level.
 In a strictly binary tree, there are no nodes with only one child, while in a complete binary tree, all nodes are as far left as possible.
 A full binary tree is a specific type of strictly binary tree where every node has either 0 or 2 children.
It’s important to note that these concepts can sometimes overlap. For example, a complete binary tree can also be a full binary tree if all nodes have exactly 2 children.
Explain the Concept of Extended Binary Tree
An extended binary tree is a type of binary tree where the null subtrees are replaced with special nodes called external nodes or external markers. These external nodes represent the absence of child nodes in the original tree.
In an extended binary tree, all the nonnull nodes are considered internal nodes. These internal nodes contain the actual data or values of the tree. The external nodes, on the other hand, are placeholders to indicate the absence of child nodes.
The purpose of using external nodes is to maintain the structural integrity of the binary tree, even when some nodes have null child pointers. It allows for a consistent representation of the tree, making it easier to perform operations and traverse the tree.
Here’s an example to illustrate the concept of an extended binary tree:
Original binary tree:
A
/ \
B C
/ \ \
D E F
Extended binary tree:
A
/ \
B C
/ \ \
D E F
/ \ / \ / \
# # # # # #
In this example, the external nodes are represented by the “#” symbol. They indicate the absence of child nodes in the original tree. The internal nodes still contain the original data values.
The use of external nodes in an extended binary tree can be beneficial in certain applications and algorithms where the null subtrees need to be explicitly represented or when you want to maintain a consistent structure for easier manipulation or traversal.
Note: Usually, internal nodes are represented by circle while external nodes are represented by rectangle.
Describe Binary Tree Traversal
Binary tree traversal refers to the process of systematically visiting and accessing each node in a binary tree. There are three main methods or algorithms commonly used for binary tree traversal: inorder traversal, preorder traversal, and postorder traversal.
Each algorithm follows a different order in which the nodes are visited.
 Inorder Traversal:
In inorder traversal, the left subtree is visited first, followed by the root node, and then the right subtree. This traversal method produces the nodes in ascending order in case of binary search trees (BST).
Algorithm for inorder traversal:

 Traverse the left subtree recursively.
 Visit the root node.
 Traverse the right subtree recursively.
In C/C++ pseudocode:
void inorderTraversal(Node* node) {
if (node == NULL)
return;
inorderTraversal(node>left);
printf(“%d “, node>data); // Process the node
inorderTraversal(node>right);
}
2. Preorder Traversal:
In preorder traversal, the root node is visited first, followed by the left subtree, and then the right subtree. This traversal method is often used to create a copy of the tree.
Algorithm for preorder traversal:
 Visit the root node.
 Traverse the left subtree recursively.
 Traverse the right subtree recursively.
In C/C++ pseudocode:
void preorderTraversal(Node* node) {
if (node == NULL)
return;
printf(“%d “, node>data); // Process the node
preorderTraversal(node>left);
preorderTraversal(node>right);
}
3. Postorder Traversal:
In postorder traversal, the left subtree is visited first, followed by the right subtree, and then the root node. This traversal method is often used to delete the tree or to perform certain calculations involving subtrees.
Algorithm for postorder traversal:
 Traverse the left subtree recursively.
 Traverse the right subtree recursively.
 Visit the root node.
In C/C++ pseudocode:
void postorderTraversal(Node* node) {
if (node == NULL)
return;
postorderTraversal(node>left);
postorderTraversal(node>right);
printf(“%d “, node>data); // Process the node
}
These traversal algorithms can be implemented recursively or using iterative approaches with the help of stacks or queues. The choice of traversal method depends on the specific requirements of the problem at hand.
Find the Inorder, Preorder, and Postorder Traversals of a given Binary Tree
To find the inorder, preorder, and postorder traversals of a given binary tree, you can apply the respective traversal algorithms. Here’s an example to illustrate how you can find these traversals:
Let’s consider the following binary tree:
A
/ \
B C
/ \ / \
D E F G
 Inorder Traversal:
In inorder traversal, the nodes are visited in the order: left subtree, root, right subtree.
The inorder traversal of the above binary tree would be: D > B > E > A > F > C > G.
 Preorder Traversal:
In preorder traversal, the nodes are visited in the order: root, left subtree, right subtree.
The preorder traversal of the above binary tree would be: A > B > D > E > C > F > G.
 Postorder Traversal:
In postorder traversal, the nodes are visited in the order: left subtree, right subtree, root.
The postorder traversal of the above binary tree would be: D > E > B > F > G > C > A.
You can implement these traversals recursively or iteratively, depending on your preference and the requirements of your programming language.
Example: Given a binary tree, the inorder, preorder, and postorder traversals can be found as follows:
1
/ \
2 3
/ \
4 5
Inorder: 4 2 5 1 3
Preorder: 1 2 4 5 3
Postorder: 4 5 2 3 1
Draw a Binary Tree when: i. Inorder and Postorder Traversals are given ii. Inorder and Preorder Traversals are given iii. Preorder and Postorder Traversals are given
Here are examples of constructing a binary tree given different combinations of traversals:
i. Inorder and Postorder Traversals:
Let’s consider the following inorder and postorder traversals:
Inorder: D > B > E > A > F > C > G
Postorder: D > E > B > F > G > C > A
To construct the binary tree, we can start by observing that the last element in the postorder traversal is always the root of the tree. So, in this case, “A” is the root.
Next, we can find the position of the root element in the inorder traversal. All the elements to the left of the root in the inorder traversal represent the left subtree, and all the elements to the right represent the right subtree.
Using this information, we can divide the postorder traversal into two parts: the left subtree and the right subtree.
By recursively applying the same process, we can construct the binary tree.
The constructed binary tree would look like:
A
/ \
B C
/ \ / \
D E F G
ii. Inorder and Preorder Traversals:
Let’s consider the following inorder and preorder traversals:
Inorder: D > B > E > A > F > C > G
Preorder: A > B > D > E > C > F > G
Similar to the previous example, we start by taking the first element in the preorder traversal as the root. In this case, “A” is the root.
We then find the position of the root element in the inorder traversal and divide it into left and right subtrees.
By recursively applying this process, we can construct the binary tree.
The constructed binary tree would look like:
A
/ \
B C
/ \ / \
D E F G
ii. Inorder and Preorder Traversals:
Let’s consider the following inorder and preorder traversals:
Inorder: D > B > E > A > F > C > G
Preorder: A > B > D > E > C > F > G
Similar to the previous example, we start by taking the first element in the preorder traversal as the root. In this case, “A” is the root.
We then find the position of the root element in the inorder traversal and divide it into left and right subtrees.
By recursively applying this process, we can construct the binary tree.
The constructed binary tree would look like:
A
/ \
B C
/ \ / \
D E F G
Draw a Binary Tree for Arithmetic Expression
Here are three examples of binary trees representing arithmetic expressions:
 Example: (2 + 3) * 4
*
/ \
+ 4
/ \
2 3
2. Example: 5 – (6 / 2)
–
/ \
5 /
/ \
6 2
3. Example: (8 + 2) * (4 – 3)
*
/ \
+ –
/ \ / \
8 2 4 3
In these examples, the operators (+, , *) are represented by the internal nodes, and the operands (numbers) are represented by the leaf nodes. The tree structure follows the order of operations, with higher precedence operators closer to the root.
Define and Classify Threaded Binary Trees
Threaded binary trees are binary trees in which additional pointers, called threads, are used to optimize tree traversal. These threads link nodes to their inorder predecessor or successor, allowing for efficient traversal without using recursion or a stack.
Threaded binary trees can be classified into two types: oneway threaded binary trees and twoway threaded binary trees.
 OneWay Threaded Binary Trees:
In a oneway threaded binary tree, each node is threaded to its inorder successor or predecessor, but not both. The threads provide a quick way to navigate in one direction, either forward or backward, during inorder traversal.
a. Right Threaded Binary Tree:
In a right threaded binary tree, each node is threaded to its inorder successor. This allows for efficient forward traversal. The right child pointer of a node, instead of pointing to the right child, points to the inorder successor.
b. Left Threaded Binary Tree:
In a left threaded binary tree, each node is threaded to its inorder predecessor. This allows for efficient backward traversal. The left child pointer of a node, instead of pointing to the left child, points to the inorder predecessor.
 TwoWay Threaded Binary Trees:
In a twoway threaded binary tree, each node is threaded to both its inorder predecessor and inorder successor. This enables efficient traversal in both directions, forward and backward.
In a twoway threaded binary tree, the left child pointer of a node points to the inorder predecessor, and the right child pointer points to the inorder successor. This provides the ability to traverse the tree in both directions without the need for additional stack space or recursion.
Both types of threaded binary trees offer advantages in terms of space efficiency and traversal speed, depending on the specific requirements of the application.
Draw Threaded Binary Trees for various Tree Traversals
Here are examples of threaded binary trees for various tree traversals:
 Inorder Threaded Binary Tree:
4
/ \
2 6
/ \ / \
1 3 5 7
Inorder Traversal: 1 2 3 4 5 6 7
In an inorder threaded binary tree, the threads are used to link each node to its inorder successor. In the above example, the right child pointers of nodes 1, 3, 5, and 7 are threaded to their respective inorder successors.
2. Preorder Threaded Binary Tree:
1
/ \
2 3
/ \ / \
4 5 6 7
Preorder Traversal: 1 2 4 5 3 6 7
In a preorder threaded binary tree, the threads are used to link each node to its preorder successor. In the above example, the right child pointers of nodes 1, 2, 4, 5, 3, and 6 are threaded to their respective preorder successors.
3. Postorder Threaded Binary Tree:
1
/ \
2 3
/ \ / \
4 5 6 7
Postorder Traversal: 4 5 2 6 7 3 1
In a postorder threaded binary tree, the threads are used to link each node to its postorder successor. In the above example, the right child pointers of nodes 2, 4, 5, 6, 7, and 3 are threaded to their respective postorder successors.
These examples demonstrate how threaded binary trees can be used to optimize different tree traversal algorithms by eliminating the need for recursion or stackbased traversal methods.
Write C functions for Inorder and Preorder Traversals in a Threaded Binary Tree
Here are C functions for performing inorder and preorder traversals in a threaded binary tree:
#include <stdio.h>
// Structure for threaded binary tree node
struct ThreadedTreeNode {
int data;
struct ThreadedTreeNode* left;
struct ThreadedTreeNode* right;
int isThreaded; // Flag to indicate if the right pointer is a thread
};
// Function to create a new threaded binary tree node
struct ThreadedTreeNode* createNode(int data) {
struct ThreadedTreeNode* newNode = (struct ThreadedTreeNode*)malloc(sizeof(struct ThreadedTreeNode));
newNode>data = data;
newNode>left = NULL;
newNode>right = NULL;
newNode>isThreaded = 0;
return newNode;
}
// Function to perform inorder traversal in a threaded binary tree
void inorderTraversal(struct ThreadedTreeNode* root) {
if (root == NULL) {
return;
}
struct ThreadedTreeNode* current = root;
while (current != NULL) {
if (current>left == NULL) {
printf(“%d “, current>data);
current = current>right;
} else {
// Find the inorder predecessor
struct ThreadedTreeNode* predecessor = current>left;
while (predecessor>right != NULL && predecessor>right != current) {
predecessor = predecessor>right;
}
if (predecessor>right == NULL) {
predecessor>right = current;
current = current>left;
} else {
predecessor>right = NULL;
printf(“%d “, current>data);
current = current>right;
}
}
}
}
// Function to perform preorder traversal in a threaded binary tree
void preorderTraversal(struct ThreadedTreeNode* root) {
if (root == NULL) {
return;
}
struct ThreadedTreeNode* current = root;
while (current != NULL) {
if (current>left == NULL) {
printf(“%d “, current>data);
current = current>right;
} else {
// Find the inorder predecessor
struct ThreadedTreeNode* predecessor = current>left;
while (predecessor>right != NULL && predecessor>right != current) {
predecessor = predecessor>right;
}
if (predecessor>right == NULL) {
printf(“%d “, current>data);
predecessor>right = current;
current = current>left;
} else {
predecessor>right = NULL;
current = current>right;
}
}
}
}
// Driver code
int main() {
// Create a sample threaded binary tree
struct ThreadedTreeNode* root = createNode(1);
root>left = createNode(2);
root>right = createNode(3);
root>left>left = createNode(4);
root>left>right = createNode(5);
root>right>left = createNode(6);
root>right>right = createNode(7);
// Perform inorder traversal
printf(“Inorder Traversal: “);
inorderTraversal(root);
printf(“\n”);
// Perform preorder traversal
printf(“Preorder Traversal: “);
preorderTraversal(root);
printf(“\n”);
return 0;
}
In this example, we have defined the structure for a threaded binary tree node and implemented functions for performing inorder and preorder traversals. The traversals are done iteratively using the threaded pointers in the tree to avoid recursion or stack usage. The main function creates a sample threaded binary tree and calls the traversal functions to display the results.
Define General Tree
A general tree, also known as a nonbinary tree, is a type of tree data structure in which each node can have an arbitrary number of child nodes. Unlike a binary tree, which restricts each node to have at most two child nodes, a general tree allows for a flexible and variable number of child nodes.
Properties of a general tree:
 Nodes: A general tree is composed of nodes. Each node can have a value or data associated with it.
 Root: The root of a general tree is the topmost node that has no parent. It serves as the starting point for traversing the tree.
 Parent and Child Nodes: Each node, except the root, has a parent node and can have zero or more child nodes. The parent node is the immediate node above the current node, while the child nodes are the immediate nodes below the current node.
 Siblings: Nodes that have the same parent are called siblings. They share the same parent node but are not necessarily connected to each other.
 Leaf Nodes: Leaf nodes, also known as terminal nodes, are nodes that have no child nodes. They are the endpoints of the tree branches.
 Depth: The depth of a node is the number of edges from the root to that node. The depth of the root node is 0, and the depth of any other node is one more than the depth of its parent.
 Height: The height of a tree is the maximum depth among all nodes in the tree. It represents the length of the longest path from the root to a leaf node.
 Degree: The degree of a node is the number of its immediate child nodes. In a general tree, the degree of a node can vary from 0 to any positive integer.
 Path: A path is a sequence of nodes that connects two nodes in the tree. It represents the traversal route from one node to another.
 Forest: A forest is a collection of disjoint trees. In other words, a forest is a set of general trees where no two trees have any common nodes.
These properties make a general tree a versatile data structure that can represent hierarchical relationships and organize data in a flexible manner.
Convert a General Tree into a Binary Tree
To convert a general tree into a binary tree, you can use a technique called “leftchild, rightsibling” representation. This representation transforms the general tree into a binary tree by considering the left child as the left subtree of a node and the right sibling as the right subtree of the same node.
Algorithm to convert a general tree into a binary tree:
 Create an empty binary tree.
 Select the root node of the general tree.
 If the root node has no children, set its left child in the binary tree as NULL.
 If the root node has at least one child, set its left child in the binary tree as the first child.
 For each subsequent child of the root node, set the right sibling of the previous child as the left child in the binary tree and set the current child as the right sibling of the previous child.
 Recursively apply steps 35 for each child of the root node.
 Return the converted binary tree.
Example:
Consider the following general tree:
A
/  \
B C D
/  \
E F G
The corresponding binary tree after conversion will be:
A
/
B
/ \
E C
/ \
F D
/
G
In this example, we start with the root node A. Since A has three children B, C, and D, we set B as the left child of A. Then, we set E as the left child of B. Moving on, C becomes the right sibling of B. We set F as the left child of C. Finally, D becomes the right sibling of C, and G becomes the left child of D.
By following this algorithm, the general tree is successfully converted into a binary tree using the leftchild, rightsibling representation.
Define Binary Search Tree
A Binary Search Tree (BST) is a binary tree data structure that follows a specific property called the Binary Search Tree property. The BST property states that for every node in the tree, the values of all nodes in its left subtree are less than its value, and the values of all nodes in its right subtree are greater than its value. This property allows for efficient searching, insertion, and deletion operations in a BST.
Properties of a Binary Search Tree:
 Binary Tree Structure: A BST is a binary tree, meaning each node has at most two children – a left child and a right child.
 Binary Search Tree Property: For every node in the BST, all the values in its left subtree are less than its value, and all the values in its right subtree are greater than its value.
 Unique Key Values: Each node in the BST has a unique key value. No two nodes can have the same key value.
 Ordering of Nodes: The nodes in the BST are ordered based on the Binary Search Tree property. In the left subtree, all values are less than the node’s value, and in the right subtree, all values are greater than the node’s value.
 Recursive Structure: The BST property holds recursively for all subtrees of the BST. This means that every subtree of the BST is also a valid BST.
 Balanced or Unbalanced: The BST can be balanced or unbalanced depending on the arrangement of nodes. In a balanced BST, the height of the left and right subtrees of any node differs by at most 1, which ensures efficient operations. In an unbalanced BST, the height difference between the subtrees can be significant, leading to less efficient operations.
The Binary Search Tree property allows for efficient searching, insertion, and deletion operations. Searching for a specific value can be done by comparing the value with the current node and traversing either the left or right subtree based on the comparison. Insertion and deletion operations maintain the BST property by appropriately rearranging the nodes.
It’s important to note that in a BST, the order of insertion affects the structure and performance of the tree. A balanced BST, such as an AVL tree or a RedBlack tree, ensures optimal performance for various operations by maintaining a balanced structure.
Create a Binary Search Tree for the given elements
To create a Binary Search Tree (BST) for a given set of elements, you can follow the following algorithm:
 Start with an empty BST.
 For each element in the given set of elements, perform the following steps:
 If the BST is empty, create a new node with the current element as its value and make it the root of the BST.
 Otherwise, compare the current element with the value of the current node.
 If the current element is less than the node’s value, move to the left child of the node.
 If the current element is greater than the node’s value, move to the right child of the node.
 Repeat this step until you reach a node that has no left or right child.
 Create a new node with the current element as its value and attach it as the left or right child of the last node reached in the previous step, based on the comparison.
 Repeat step 2 for all elements in the given set.
Example:
Let’s create a BST for the following set of elements: [5, 2, 8, 1, 7, 3, 9]
 Start with an empty BST.
 Insert the first element, 5:
 Since the BST is empty, create a new node with value 5 and make it the root of the BST.
 5
3. Insert the second element, 2:
 Compare 2 with the root (5).
 Since 2 is less than 5, move to the left child.
 Since the left child is null, create a new node with value 2 and attach it as the left child of 5.
5
/
2
4. Insert the third element, 8:
Compare 8 with the root (5).
 Since 8 is greater than 5, move to the right child.
 Since the right child is null, create a new node with value 8 and attach it as the right child of 5.
5
/ \
2 8
5. Insert the fourth element, 1:
 Compare 1 with the root (5).
 Since 1 is less than 5, move to the left child.
 Compare 1 with the node (2).
 Since 1 is less than 2, move to the left child.
 Since the left child is null, create a new node with value 1 and attach it as the left child of 2.
5
/ \
2 8
/
1
6. Insert the fifth element, 7:
 Compare 7 with the root (5).
 Since 7 is less than 5, move to the left child.
 Compare 7 with the node (2).
 Since 7 is greater than 2 as well as 5, move to the left of 8.
 Since the right child is null, create a new node with value 7 and attach it as the left child of 8.
5
/ \
2 8
/ /
1 7
7. Insert the sixth element, 3:
 Compare 3 with the root (5).
 Since 3 is less than 5, move to the left child.
 Compare 3 with the node (2).
 Since 3 is greater than 2, move to the right child.
 Since 3 is less than 5, move to the left child.
 Since the left child is null, create a new node with value 3 and attach it as theright child of 2.
5
/ \
2 8
/ \ /
1 3 7
8. Insert the seventh element, 9
5
/ \
2 8
/ \ / \
1 3 7 9
The final BST for the given set of elements is as shown above.
Describe Insertion and Deletion operations to be performed with BST
Insertion Operation in Binary Search Tree (BST):
 Start at the root of the BST.
 If the BST is empty, create a new node with the given value and make it the root.
 If the given value is less than the current node’s value, move to the left child.
 If the left child is null, create a new node with the given value and attach it as the left child of the current node.
 If the left child is not null, repeat steps 3 to 5 recursively with the left child as the new current node.
 If the given value is greater than the current node’s value, move to the right child.
 If the right child is null, create a new node with the given value and attach it as the right child of the current node.
 If the right child is not null, repeat steps 3 to 5 recursively with the right child as the new current node.
 If the given value is equal to the current node’s value, the value already exists in the BST (assuming duplicates are not allowed), and no action is required.
 Repeat steps 2 to 5 until the new node is inserted into the BST.
Deletion Operation in Binary Search Tree (BST):
 Start at the root of the BST.
 If the BST is empty, there is no node to delete, so return.
 If the value to be deleted is less than the current node’s value, move to the left child.
 If the left child is null, the value does not exist in the BST, so return.
 If the left child’s value is equal to the value to be deleted, perform the deletion operation for a node with no or one child (see step 4).
 If the left child’s value is not equal to the value to be deleted, repeat steps 3 to 5 recursively with the left child as the new current node.
 If the value to be deleted is greater than the current node’s value, move to the right child.
 If the right child is null, the value does not exist in the BST, so return.
 If the right child’s value is equal to the value to be deleted, perform the deletion operation for a node with no or one child (see step 4).
 If the right child’s value is not equal to the value to be deleted, repeat steps 3 to 5 recursively with the right child as the new current node.
 If the value to be deleted is equal to the current node’s value, perform the deletion operation based on the following cases:
 If the current node is a leaf node (no children), simply remove the node from the BST.
 If the current node has one child, replace the current node with its child.
 If the current node has two children, find the minimum value in its right subtree (or the maximum value in its left subtree), replace the current node’s value with that minimum (or maximum) value, and delete the node with that minimum (or maximum) value recursively from the right (or left) subtree.
 Repeat steps 2 to 5 until the node with the given value is deleted from the BST.
Note: The deletion operation in a BST may require balancing the tree to maintain the binary search property.
Define Complexities of Insertion into and Deletion from BST
The complexities of insertion and deletion operations in a Binary Search Tree (BST) can vary depending on the structure of the tree. Here are the complexities in the best, average, and worst cases:
Insertion Complexity:
Best Case: O(1)
 In the best case, when the tree is perfectly balanced, the insertion operation can be done in constant time. This occurs when the tree is initially empty, and the new node becomes the root.
Average Case: O(log n)
 In the average case, assuming a balanced BST, the insertion operation takes logarithmic time. This is because each level of the tree divides the search space in half, resulting in a balanced tree structure.
Worst Case: O(n)
 In the worst case, when the tree is skewed or unbalanced, the insertion operation can take linear time. This occurs when the tree is already sorted, and each new node is inserted in a way that it becomes the left or right child of the previous node, resulting in a long chainlike structure.
Deletion Complexity:
Best Case: O(1)
 The best case for deletion occurs when the node to be deleted is a leaf node (no children). In this case, the deletion operation can be done in constant time.
Average Case: O(log n)
 In the average case, assuming a balanced BST, the deletion operation takes logarithmic time. This is because each level of the tree divides the search space in half, resulting in a balanced tree structure.
Worst Case: O(n)
 The worst case for deletion occurs when the tree is skewed or unbalanced, and the node to be deleted has two children. In this case, finding the replacement node (either the minimum value in the right subtree or the maximum value in the left subtree) requires traversing the entire height of the tree, resulting in a linear time complexity.
Note: The complexities mentioned above assume that the BST is not selfbalancing. Selfbalancing BSTs like AVL tree or RedBlack tree can guarantee a worstcase complexity of O(log n) for both insertion and deletion operations.
Define AVL Search Tree
An AVL (AdelsonVelsky and Landis) tree is a selfbalancing binary search tree. An AVL tree is a selfbalancing binary search tree with the following properties:
 Binary Search Tree Property: The AVL tree follows the binary search tree property, which means that the key of each node in the left subtree is less than the key of the node, and the key of each node in the right subtree is greater than the key of the node.
 Balance Factor Property: For every node in the AVL tree, the heights of its left and right subtrees differ by at most 1. The balance factor of a node is defined as the height of its right subtree minus the height of its left subtree. Therefore, the balance factor can be 1, 0, or 1 for each node.
 Balance Restoration Property: Whenever an insertion or deletion operation is performed on the AVL tree, if the balance factor of any node becomes greater than 1 or less than 1, the tree is rebalanced to maintain the balance factor property. This is achieved through rotations and other necessary operations to restore the balance of the tree.
 Height Property: The height of an AVL tree is always logarithmic in the number of nodes. It ensures efficient search, insertion, and deletion operations with a time complexity of O(log n) in the worst case.
The properties of an AVL tree guarantee that the tree remains balanced, which ensures efficient and consistent performance for various operations. The selfbalancing nature of AVL trees distinguishes them from regular binary search trees and helps maintain their desirable properties even with frequent insertions and deletions.
Recall the Balancing methods of AVL Trees
AVL trees use different balancing methods to maintain the balance factor property and keep the tree height balanced. The balancing methods include rotations and other operations that are performed during insertion and deletion operations.
The two main balancing methods used in AVL trees are:
 Left Rotation: A left rotation is performed when the right subtree of a node becomes heavier than the left subtree (balance factor > 1). It involves rotating the node and its right child to the left, making the right child the new root of the subtree. This helps in rebalancing the tree and maintaining the balance factor property.
 Right Rotation: A right rotation is performed when the left subtree of a node becomes heavier than the right subtree (balance factor < 1). It involves rotating the node and its left child to the right, making the left child the new root of the subtree. This helps in rebalancing the tree and maintaining the balance factor property.
In addition to left and right rotations, AVL trees may also require double rotations to achieve balance. These include:
 LeftRight Rotation: A leftright rotation is performed when the left child of a node has a right subtree that is heavier. It involves rotating the left child to the left and then rotating the node to the right. This helps in rebalancing the tree and maintaining the balance factor property.
 RightLeft Rotation: A rightleft rotation is performed when the right child of a node has a left subtree that is heavier. It involves rotating the right child to the right and then rotating the node to the left. This helps in rebalancing the tree and maintaining the balance factor property.
The balancing methods in AVL trees ensure that the height of the tree remains balanced, which leads to efficient search, insertion, and deletion operations with a time complexity of O(log n) in the worst case.
Create AVL search tree for Numerical or Alphabetical Sequences
The creation of an AVL tree for a numerical or alphabetical sequence follows the same steps as for a binary search tree. The difference is that, in an AVL tree, rotations are performed whenever a height difference between the left and right subtrees of any node exceeds 1, in order to maintain balance.
Here is a stepbystep process:
 Start with an empty tree.
 Insert the numbers one by one into the tree. The first number inserted becomes the root node of the tree.
 After each insertion, check the balance factor of every node in the tree. The balance factor of a node is the height of its right subtree minus the height of its left subtree.
 If the balance factor of any node is greater than 1 or less than 1, then the tree is unbalanced and a rotation needs to be performed.
 Perform the appropriate rotation to balance the tree. There are four types of rotations: left rotation, right rotation, leftright rotation, and rightleft rotation.
 Continue inserting the remaining numbers and checking the balance factor after each insertion until all numbers have been inserted.
Here is an example of how to generate an AVL search tree for the numbers 5, 3, 7, 2, 4, 6, and 8:
 Start with an empty tree.
 Insert 5 into the tree. The tree now looks like this:
5
 Check the balance factor of the root node. The balance factor is 0, so the tree is balanced.
 Insert 3 into the tree. The tree now looks like this:
5
/
3
 Check the balance factor of the root node. The balance factor is 1, which means the tree is unbalanced.
 Perform a right rotation on the root node. The tree now looks like this:
3
\
5
 Insert 7 into the tree. The tree now looks like this:
3
\
5
\
7
 Check the balance factor of the root node. The balance factor is 1, which means the tree is unbalanced.
 Perform a left rotation on the root node. The tree now looks like this:
5
/ \
3 7
 Insert 2 into the tree. The tree now looks like this:
5
/ \
3 7
/
2
 Check the balance factor of the root node. The balance factor is 2, which means the tree is unbalanced.
 Perform a right rotation on the left subtree. The tree now looks like this:
5
/ \
2 7
\
3
 Insert 4 into the tree. The tree now looks like this:
5
/ \
2 7
\
3
\
4
Check the balance factor of the root node. The balance factor is 2, which means the tree is unbalanced.
 Perform a left rotation on the node 3. The tree now looks like this:
5
/ \
3 7
/ \
2 4
 Insert 6 into the tree. The tree now looks like this:
5
/ \
3 7
/ \ /
2 4 6
 Check the balance factor of the root node. The balance factor is 2, which means the tree is unbalanced
 Insert 8 into the tree. The tree now looks like this:
5
/ \
3 7
/ \ / \
2 4 6 8
Check the balance factor of the root node. The balance factor is 0, which means the tree is balanced.
This AVL tree is balanced and satisfies the property that the height of the left and right subtrees of any node differs by at most 1. The search time for this AVL tree is guaranteed to be O(log n) for n elements in the tree.
List Applications of Trees for the representation of Sets
Trees are commonly used for the representation of sets in various applications. Some of the applications of trees for set representation include:
 Database Systems: Trees are used to represent indexes in database systems. Each node in the tree represents a key value, and the structure of the tree allows for efficient searching, insertion, and deletion of records.
 File Systems: Trees are used to represent file systems in operating systems. Each node in the tree represents a directory or a file, and the hierarchical structure of the tree helps in organizing and navigating the file system.
 Symbol Tables: Trees are used to implement symbol tables in programming languages and compilers. Each node in the tree represents a symbol (e.g., variable or function), and the tree allows for efficient symbol lookup and management.
 Routing Tables: Trees are used to represent routing tables in network routing algorithms. Each node in the tree represents a network address or a route, and the tree structure helps in efficient routing of network packets.
 Decision Trees: Trees are used in decisionmaking processes, such as in decision tree algorithms for classification and regression problems. Each node in the tree represents a decision point, and the tree structure helps in organizing and navigating through the decision process.
 Huffman Coding: Trees are used in data compression algorithms, such as Huffman coding, where each node in the tree represents a symbol or a combination of symbols. The tree structure helps in efficient encoding and decoding of data.
These are just a few examples of how trees can be used for the representation of sets in various applications. The flexibility and efficiency of trees make them a powerful data structure for managing and organizing sets of data.
Recall Heap and its Memory representation
A heap is a complete binary tree data structure that satisfies the heap property. The heap property states that for every node in the tree, the value of the node is either greater than or equal to (in a max heap) or less than or equal to (in a min heap) the values of its children.
Types of Heap:
 Max Heap: In a max heap, the value of each node is greater than or equal to the values of its children. The maximum value is always stored at the root of the heap.
 Min Heap: In a min heap, the value of each node is less than or equal to the values of its children. The minimum value is always stored at the root of the heap.
Memory Representation of a Heap:
A heap can be represented in memory using an array. The array stores the elements of the heap in a specific order that maintains the heap property.
In the memory representation:
 The root of the heap is stored at index 0 of the array.
 For any node at index i, its left child is located at index (2i + 1) and its right child is located at index (2i + 2).
 Conversely, for any node at index i (except the root), its parent is located at index ((i – 1) / 2).
By using this array representation, the heap can be efficiently stored and manipulated. The array allows for random access to elements and preserves the complete binary tree structure of the heap.
For example, consider a max heap with the following elements:
9
/ \
7 6
/ \ / \
4 5 3 2
In the array representation, the elements would be stored as: [9, 7, 6, 4, 5, 3, 2]
Using the index calculations, we can see that the parentchild relationships are preserved:
 The root element 9 is stored at index 0.
 The left child of 9 (7) is stored at index (2*0 + 1) = 1.
 The right child of 9 (6) is stored at index (2*0 + 2) = 2.
 The left child of 7 (4) is stored at index (2*1 + 1) = 3.
 The right child of 7 (5) is stored at index (2*1 + 2) = 4.
 And so on.
This memory representation of a heap allows for efficient operations like insertion, deletion, and heapify, which maintain the heap property.
Recall Heap Operations: Insert, Delete, Sort etc
Heap Operations:
 Insertion:
Algorithm:

 Add the new element to the end of the heap array.
 Compare the value of the new element with its parent.
 If the new element is greater (in a max heap) or smaller (in a min heap) than its parent, swap them.
 Continue swapping until the new element is in the correct position or reaches the root.
 Deletion:
Algorithm:

 Replace the root element (maximum element in a max heap or minimum element in a min heap) with the last element in the heap array.
 Compare the new root with its children.
 If the new root is smaller (in a max heap) or larger (in a min heap) than any of its children, swap it with the larger (max heap) or smaller (min heap) child.
 Continue swapping until the new root is in the correct position or reaches a leaf node.
 Heapify:
Algorithm:

 Starting from the last nonleaf node to the root, perform the following steps:
 Compare the node with its children.
 If the node is smaller (in a max heap) or larger (in a min heap) than any of its children, swap it with the larger (max heap) or smaller (min heap) child.
 Continue this process recursively until the entire heap is heapified.
 Starting from the last nonleaf node to the root, perform the following steps:
 Heap Sort:
Algorithm:

 Build a max heap from the input array.
 Swap the root element (maximum element) with the last element of the heap array.
 Reduce the heap size by one and heapify the new root element.
 Repeat the above steps until the heap is empty.
 The elements extracted from the heap in each iteration will be in sorted order.
Note: The algorithms provided above assume a max heap. For a min heap, the comparison operations and swapping conditions will be reversed.
These operations ensure that the heap maintains its properties and can be used for various purposes like efficient priority queue implementation, sorting, finding the kth largest/smallest element, and more.
Differentiate between MinHeap and MaxHeap
MinHeap and MaxHeap are two types of binary heaps with different ordering properties. Here is a comparison between MinHeap and MaxHeap in tabular form:
Property  MinHeap  MaxHeap 
Root Node  Contains the minimum value  Contains the maximum value 
ParentChild Relation  Parent node is always smaller than children  Parent node is always greater than children 
Heap Property  Every parent node is smaller than its children  Every parent node is greater than its children 
Sorting Order  Elements are sorted in nondecreasing order  Elements are sorted in nonincreasing order 
Applications  Priority queue with minimum priority  Priority queue with maximum priority 
In a MinHeap, the root node contains the minimum value, and every parent node is smaller than its children. This ensures that the smallest element is always at the root. On the other hand, in a MaxHeap, the root node contains the maximum value, and every parent node is greater than its children. This ensures that the largest element is always at the root.
The ordering of elements in a MinHeap is such that they are sorted in nondecreasing order, while in a MaxHeap, they are sorted in nonincreasing order.
Both MinHeap and MaxHeap have applications in priority queues, where elements are accessed based on their priority. The choice between MinHeap and MaxHeap depends on whether you need to access the minimum or maximum priority element.
Create MinHeap/MaxHeap for the given elements and describe Heapify operation
To create a minheap or a maxheap for a given set of elements, we can insert each element into an initially empty binary heap and then perform the heapify operation. Heapify is the process of adjusting the binary heap so that it remains a valid minheap or maxheap after an element insertion.
For example, after inserting an element into a minheap, we compare the inserted element with its parent. If the inserted element is smaller than its parent, we swap the two elements. We then repeat this process until the minheap property is restored.
Here is an example of creating a minheap for the elements [10, 20, 15, 17, 25]:
Step 1: Insert 10 into the binary heap and perform heapify operation.
10
Step 2: Insert 20 into the binary heap and perform heapify operation.
10
/
20
Step 3: Insert 15 into the binary heap and perform heapify operation.
10
/ \
20 15
Step 4: Insert 17 into the binary heap and perform heapify operation.
10
/ \
20 15
/
17
Step 5: Insert 25 into the binary heap and perform heapify operation.
10
/ \
20 15
/ \
17 25
Describe Applications of the Heap
The heap data structure has various applications in computer science due to its efficient operations. Here are some common applications of heaps:
 Priority Queues: Heaps are commonly used to implement priority queues, where elements are assigned priorities and are accessed based on their priority level. The heap’s property allows for efficient insertion and removal of the element with the highest or lowest priority, depending on whether it is a maxheap or minheap.
 Sorting: Heapsort is an efficient sorting algorithm that uses a binary heap. It achieves a time complexity of O(n log n) in the worst case and is an inplace sorting algorithm. Heapsort can be advantageous when memory is limited or when a stable sorting algorithm is not required.
 Eventdriven Systems: Heaps are useful in eventdriven systems, such as event schedulers or event handling systems. Events can be stored in a priority queue implemented using a heap, and they can be processed based on their priority or scheduled time.
 Graph Algorithms: Heaps are used in various graph algorithms, such as Dijkstra’s algorithm for finding the shortest path, Prim’s algorithm for finding the minimum spanning tree, and Kruskal’s algorithm for finding the minimum spanning forest. The heap is used to efficiently select the next vertex or edge with the minimum or maximum weight during the algorithm’s execution.
The complexities of the heap operations are as follows:
 Insertion: The complexity of inserting an element into a heap is O(log n), where n is the number of elements in the heap. This complexity arises from the need to maintain the heap property by comparing and swapping elements as needed.
 Deletion: The complexity of deleting the minimum or maximum element from a heap is O(log n), where n is the number of elements in the heap. Similar to insertion, the deletion operation involves restoring the heap property by comparing and swapping elements.
 Peek: The complexity of accessing the minimum or maximum element (without removing it) from a heap is O(1). The root node of the heap contains the desired element.
 Heapify: The complexity of converting an array into a heap, known as heapify, is O(n), where n is the number of elements in the array. This process involves adjusting the elements of the array to satisfy the heap property.
Overall, heaps provide efficient operations for prioritybased data structures and are widely used in various algorithms and applications that require efficient access to the minimum or maximum element.
Describe Huffman Algorithm
The Huffman algorithm is a popular algorithm used for data compression, particularly for lossless compression of text or binary data. It was developed by David A. Huffman in 1952.
The algorithm works by constructing a variablelength prefix coding scheme based on the frequency of occurrence of each character in the input data. Characters that occur more frequently are assigned shorter codes, while characters that occur less frequently are assigned longer codes. This ensures that the most commonly occurring characters are represented by shorter codes, leading to overall compression of the data.
The steps of the Huffman algorithm are as follows:
 Frequency Analysis: The input data is analyzed to determine the frequency of occurrence of each character. This can be done by counting the occurrences of each character in the data.
 Create Huffman Tree: Based on the frequency analysis, a Huffman tree is constructed. Initially, each character is represented by a leaf node in the tree. The frequency of each character is used as the weight of the corresponding leaf node.
 Combine Nodes: The two nodes with the lowest frequency are combined into a single node, with the combined frequency as the sum of the frequencies of the two nodes. This process is repeated until all the nodes are combined into a single tree.
 Assign Codes: Traverse the Huffman tree from the root to each leaf node, assigning a binary code to each character. The binary code is determined by the path taken from the root to the leaf node, with ‘0’ representing a left branch and ‘1’ representing a right branch.
 Generate Huffman Codes: Once the codes are assigned to each character, a Huffman code table is created that maps each character to its corresponding Huffman code.
 Encode Data: The input data is encoded by replacing each character with its corresponding Huffman code. The encoded data is typically represented using bits instead of characters, resulting in compression.
 Decode Data: The encoded data can be decoded by traversing the Huffman tree using the encoded bits. Starting from the root, each ‘0’ bit corresponds to a left branch, and each ‘1’ bit corresponds to a right branch. The traversal continues until a leaf node is reached, and the corresponding character is output. This process is repeated for each encoded character in the data.
The Huffman algorithm is widely used in various compression algorithms, such as ZIP and GZIP, as well as in image and video compression algorithms. It provides efficient compression by assigning shorter codes to more frequently occurring characters, resulting in significant reduction in the size of the data while maintaining its original content.
Apply Huffman Algorithm and generate the Binary code for each element
Let’s consider an example where we have a set of characters and their corresponding frequencies:
Character  Frequency
A  5
B  7
C  10
D  15
E  20
Using the Huffman algorithm, we can generate the binary codes for each character based on their frequencies. Here’s the stepbystep process:
 Create Leaf Nodes:
 Create leaf nodes for each character, representing their frequencies:
 Node A with frequency 5
 Node B with frequency 7
 Node C with frequency 10
 Node D with frequency 15
 Node E with frequency 20
 Create leaf nodes for each character, representing their frequencies:
 Build Huffman Tree:
 Combine the two nodes with the lowest frequencies and create a parent node with the combined frequency:
 Combine nodes A and B into a parent node with frequency 12
 Combine nodes C and D into a parent node with frequency 25
 Combine the parent node of A and B with the parent node of C and D into a root node with frequency 37
 Combine the two nodes with the lowest frequencies and create a parent node with the combined frequency:
 Assign Binary Codes:
 Traverse the Huffman tree and assign binary codes to each character:
 Left branch represents ‘0’ and right branch represents ‘1’
 Assign ‘0’ to character A, ’10’ to character B, ‘110’ to character C, ‘111’ to character D, ‘1’ to character E
 Traverse the Huffman tree and assign binary codes to each character:
 Generate Huffman Codes:
 Create a Huffman code table with each character and its corresponding binary code:
 A: 0
 B: 10
 C: 110
 D: 111
 E: 1
 Create a Huffman code table with each character and its corresponding binary code:
So, the binary codes for each character using the Huffman algorithm in this example would be:
 A: 0
 B: 10
 C: 110
 D: 111
 E: 1
These codes can be used to encode the characters in the original data for compression purposes.
Define and Classify mway Search Tree
An mway search tree is a type of search tree where each node can have at most m children. It is a generalization of binary search tree where each node in an mway tree can have more than two children. The mway search tree is also known as an mary search tree.
The mway search tree can be classified based on the following characteristics:
 Order: The order of an mway search tree refers to the maximum number of children that each node can have. It is denoted by ‘m’.
 Key Values: The keys in an mway search tree can have different properties based on the application. Some common types of mway search trees based on key values are:
 General Tree: Each node can have any number of key values.
 Binary Search Tree (BST): Each node can have at most two key values, and the keys follow the BST property where the left child has a smaller key and the right child has a larger key.
 BTree: Each node can have at most ‘m’ key values, and the keys are stored in sorted order within each node. The keys also follow the property that all keys in the left subtree of a node are less than the keys in the node, and all keys in the right subtree are greater than the keys in the node.
 Balancing: Similar to binary search trees, mway search trees can be balanced or unbalanced. Balanced mway search trees ensure that the height of the tree is logarithmic in the number of nodes, which leads to efficient search and insertion operations. Some common balanced mway search trees are Btrees and B+ trees.
Overall, the mway search tree provides a flexible structure for organizing and searching data, allowing for efficient operations depending on the specific requirements and properties of the tree.
Recall BTree
A Btree is a specialized mway tree that is commonly used for disk access because it can efficiently store and retrieve large amounts of data. The properties you mentioned help maintain balance and efficiency in the Btree structure.
To summarize the properties:
 Every node in a Btree contains at most m children. This property ensures that each node can have multiple child nodes, allowing the Btree to store a large number of keys in a single node.
 Every node in a Btree, except the root node and the leaf nodes, contains at least m/2 children. This property guarantees that the nodes in the Btree remain reasonably full, preventing excessive splitting or merging of nodes during insertions or deletions.
 The root node must have at least 2 children. This property ensures that the Btree has a welldefined entry point and is not a degenerate tree.
 All leaf nodes must be at the same level. This property ensures that accessing data in the Btree is efficient since all leaf nodes are at the same depth. It allows for a predictable search time complexity.
It is important to note that while all nodes in a Btree have a lower bound of m/2 children (except for the root and leaf nodes), it is not necessary for all nodes to contain the same number of children. The number of children can vary within the range specified by the properties.
By maintaining these properties, a Btree can effectively balance the tree structure and keep the height of the tree relatively small compared to the number of keys stored, resulting in efficient disk access operations.
Additionally, A Btree is a selfbalancing search tree data structure that maintains sorted data and allows efficient search, insertions, and deletions. It is commonly used in database systems and file systems where large amounts of data need to be stored and accessed efficiently.
Properties of a Btree:
 Order: A Btree of order ‘m’ is an mary tree where each node can have at most m children. The minimum number of children a nonroot internal node can have is ceil(m/2), and the maximum number of children a node can have is m. The number of keys in a node is one less than the number of children.
 Balanced: A Btree is a balanced tree, meaning that all leaf nodes are at the same level. This ensures that the height of the tree remains relatively small, resulting in efficient search and insertion operations with a time complexity of O(log n).
 Search: Btree supports efficient search operations. Starting from the root node, a search operation follows a binary searchlike algorithm to find the target key. It compares the target key with the keys in the current node and recursively descends to the appropriate child node based on the comparison result.
 Insertion: When inserting a new key into a Btree, the tree is modified to maintain its properties and balance. If the target node is not full, the key is inserted into the node in sorted order. If the target node is full, it is split into two nodes, and the median key is promoted to the parent node. This splitting and promotion process may propagate up the tree, potentially splitting higherlevel nodes as well.
 Deletion: When deleting a key from a Btree, the tree is modified to maintain its properties and balance. If the target key is found in a leaf node, it is simply removed. If the target key is found in an internal node, it is replaced with its predecessor or successor key, and the predecessor or successor key is then recursively deleted from its respective leaf node.
 Multilevel Structure: Btrees have multiple levels, with the root at the top and leaf nodes at the bottom. Internal nodes act as separators or guides for searching, while leaf nodes store the actual data.
 DiskBased Storage: Btrees are designed to work efficiently with diskbased storage systems. The nodes of a Btree are typically large enough to fill a disk block, reducing the number of disk accesses required for search and update operations.
Overall, the Btree provides an efficient and scalable data structure for handling large datasets and is widely used in various applications that require fast and reliable data storage and retrieval.
Create B Tree for the given elements
Example: Create BTree of degree 3 for the following sequence of integers 10, 20, 30, 40, 50, 60, 70, 80 and 90 in an initially empty BTree.
Let us insert 10 in an empty BTree
Let us now insert 20, 30, 40 and 50. They all will be inserted in root because the maximum number of keys a node can accommodate is 2*t â€“ 1 which is 5.
Let us now insert 60. Since root node is full, it will first split into two, then 60 will be inserted into the appropriate child.
Let us now insert 70 and 80. These new keys will be inserted into the appropriate leaf without any split.
Let us now insert 90. This insertion will cause a split. The middle key will go up to the parent.
Here’s an example of a C program that creates a Btree:
#include <stdio.h>
#include <stdlib.h>
// Structure for a Btree node
typedef struct node {
int *keys; // Array of keys
struct node **child; // Array of child pointers
int isLeaf; // Flag to indicate if the node is a leaf
int numKeys; // Current number of keys in the node
} Node;
// Function to create a new Btree node
Node *createNode(int order, int isLeaf) {
Node *newNode = (Node *)malloc(sizeof(Node));
newNode>keys = (int *)malloc((order1) * sizeof(int));
newNode>child = (Node **)malloc(order * sizeof(Node *));
newNode>isLeaf = isLeaf;
newNode>numKeys = 0;
for (int i = 0; i < order; i++) {
newNode>child[i] = NULL;
}
return newNode;
}
// Function to split a full child node
void splitChild(Node *parent, int index, Node *child, int order) {
Node *newNode = createNode(order, child>isLeaf);
newNode>numKeys = order – 1;
// Copy the right half of keys from the child node to the new node
for (int i = 0; i < order – 1; i++) {
newNode>keys[i] = child>keys[i + order];
}
// If the child node is not a leaf, copy the right half of child pointers
if (!child>isLeaf) {
for (int i = 0; i < order; i++) {
newNode>child[i] = child>child[i + order];
}
}
// Update the number of keys in the child node
child>numKeys = order – 1;
// Shift the child pointers in the parent node to make space for the new node
for (int i = parent>numKeys; i > index; i–) {
parent>child[i + 1] = parent>child[i];
}
// Link the new node to the parent node
parent>child[index + 1] = newNode;
// Shift the keys in the parent node to make space for the key from the child node
for (int i = parent>numKeys – 1; i >= index; i–) {
parent>keys[i + 1] = parent>keys[i];
}
// Copy the middle key from the child node to the parent node
parent>keys[index] = child>keys[order – 1];
// Update the number of keys in the parent node
parent>numKeys++;
}
// Function to insert a key into the Btree
void insert(Node **root, int key, int order) {
Node *temp = *root;
// If the root is full, create a new root node
if (temp>numKeys == order – 1) {
Node *newNode = createNode(order, 0);
newNode>child[0] = temp;
*root = newNode;
splitChild(newNode, 0, temp, order);
}
// Traverse the tree to find the appropriate leaf node for insertion
int i = temp>numKeys – 1;
while (i >= 0 && key < temp>keys[i]) {
i–;
}
// If the leaf node is full, split it
if (temp>child[i + 1] && temp>child[i + 1]>numKeys == order – 1) {
splitChild(temp, i + 1, temp>child[i + 1], order);
if (key > temp>keys[i + 1]) {
i++;
}
}
// Insert the key into the leaf node
temp = temp>child[i + 1];
int j = temp>numKeys – 1;
while (j >= 0 && key < temp>keys[j]) {
temp>keys[j + 1] = temp>keys[j];
j–;
}
temp>keys[j + 1] = key;
temp>numKeys++;
}
// Function to print the Btree in inorder traversal
void inorderTraversal(Node *root) {
if (root != NULL) {
int i;
for (i = 0; i < root>numKeys; i++) {
inorderTraversal(root>child[i]);
printf(“%d “, root>keys[i]);
}
inorderTraversal(root>child[i]);
}
}
int main() {
int order;
printf(“Enter the order of the Btree: “);
scanf(“%d”, &order);
Node *root = createNode(order, 1);
int numKeys;
printf(“Enter the number of keys to insert: “);
scanf(“%d”, &numKeys);
int key;
printf(“Enter the keys to insert: “);
for (int i = 0; i < numKeys; i++) {
scanf(“%d”, &key);
insert(&root, key, order);
}
printf(“Inorder traversal of the Btree: “);
inorderTraversal(root);
printf(“\n”);
return 0;
}
This program prompts the user to enter the order of the Btree and the number of keys to insert. Then, it inserts the keys into the Btree and performs an inorder traversal to display the keys in sorted order.
Please note that this is a simplified example and may not handle all possible scenarios or input validations.
Describe Insertion and Deletion operations to be performed with the BTree
Here’s a description of the insertion and deletion operations in a Btree along with their algorithms:
Insertion Operation:
 Start at the root node and traverse down the tree to find the appropriate leaf node for insertion.
 If the leaf node is not full (less than m1 keys), insert the new key into the leaf node in its sorted position.
 If the leaf node is full, split the leaf node into two and promote the middle key to the parent node.
 If the parent node becomes full due to the split, repeat the process recursively.
 If the root node becomes full, create a new root node and split the existing root node to make space for the new key.
 After insertion, ensure that all nodes satisfy the Btree properties.
Insertion Algorithm:
insert(root, key, order):
1. If root is full, create a new empty node and set it as the new root.
2. Start at the root and traverse down the tree to find the appropriate leaf node for insertion.
3. If the leaf node is full, split it and promote the middle key to the parent node.
4. Insert the key into the leaf node in its sorted position.
5. If the parent node becomes full due to the split, repeat the process recursively.
6. If the root node becomes full, create a new root node and split the existing root node.
7. Ensure all nodes satisfy the Btree properties.
Deletion Operation:
 Start at the root node and traverse down the tree to find the node containing the key to be deleted.
 If the key is found in a leaf node, remove the key from the node.
 If the key is found in an internal node, replace it with the maximum key from its left child or the minimum key from its right child.
 If the node from which the key is removed becomes less than half full, perform a node merge or redistribution.
 If the root node becomes empty after deletion, set its only child as the new root.
 After deletion, ensure that all nodes satisfy the Btree properties.
Deletion Algorithm:
delete(root, key):
1. Start at the root and traverse down the tree to find the node containing the key.
2. If the key is found in a leaf node, remove the key from the node.
3. If the key is found in an internal node:
– Replace it with the maximum key from its left child (predecessor) or the minimum key from its right child (successor).
– Recursively delete the predecessor or successor from the appropriate child node.
4. If the node from which the key is removed becomes less than half full:
– If a sibling node has more than m/2 keys, perform a node redistribution.
– If both sibling nodes have m/2 keys, perform a node merge.
5. If the root node becomes empty after deletion, set its only child as the new root.
6. Ensure all nodes satisfy the Btree properties.
These algorithms describe the highlevel steps involved in inserting and deleting keys in a Btree. However, implementation details may vary depending on the specific Btree variant and programming language used.
Recall B+ Tree
A B+ tree is a specialized type of Btree that is commonly used in database systems and file systems for efficient data storage and retrieval. It shares many similarities with a Btree but has some distinct characteristics.
Here are the key features of a B+ tree:
 All data entries (keyvalue pairs) are stored in the leaf nodes of the B+ tree. The internal nodes of the tree act as indexes, containing only keys and pointers to child nodes.
 The leaf nodes are linked together in a linked list, which allows for efficient range queries and sequential access of data.
 All leaf nodes are at the same level, ensuring balanced access times.
 Keys are stored in sorted order within each node, allowing for efficient search operations using binary search.
 Each internal node contains a range of keys that define the range of keys stored in its child subtree. This helps in quickly navigating to the appropriate child node during search operations.
 B+ trees are typically designed to have a high fanout (number of keys/pointers in each node), which reduces the height of the tree and improves search performance.
 B+ trees support efficient insertion and deletion operations while maintaining the tree’s balance and properties.
 B+ trees are commonly used in scenarios where diskbased storage is involved, as they minimize disk I/O by optimizing sequential access and reducing the height of the tree.
In summary, a B+ tree is an extension of the Btree data structure that is optimized for efficient diskbased storage and retrieval operations, particularly in database systems and file systems. It provides fast search, insertion, and deletion operations while maintaining balanced access times and minimizing disk I/O.
Describe Operations to be performed with the B+ Tree
A B+ tree supports various operations for efficient data storage and retrieval. Here are the main operations typically performed with a B+ tree:
 Search: Given a key, the search operation finds the corresponding value in the B+ tree, if it exists. The search starts at the root node and recursively traverses down the tree, following the appropriate child pointers based on the key values in the nodes. Once a leaf node is reached, a binary search is performed within the leaf node to locate the desired key.
 Insertion: The insertion operation adds a new keyvalue pair to the B+ tree while maintaining its properties. The process starts with a search to find the appropriate leaf node for insertion. If the leaf node is not full, the new keyvalue pair is inserted in its sorted position. If the leaf node is full, a split operation is performed to create a new leaf node and redistribute the keys. The middle key is then promoted to the parent node, and the process may continue recursively if necessary.
 Deletion: The deletion operation removes a keyvalue pair from the B+ tree while maintaining its properties. Similar to insertion, a search is performed to find the leaf node containing the key to be deleted. If the key is found, it is removed from the leaf node. If the leaf node becomes less than half full after deletion, a redistribution or merging operation may be performed with neighboring nodes to balance the tree.
 Range Queries: B+ trees excel at supporting range queries efficiently. With the linked list structure of leaf nodes, it becomes easier to perform rangebased operations, such as retrieving all keyvalue pairs within a specific range. The linked list allows for sequential access, reducing disk I/O and improving performance for rangebased operations.
 Traversal: Traversal operations can be performed on a B+ tree to visit and process all keyvalue pairs in a specific order. Inorder traversal is commonly used, which visits the nodes in ascending order based on the keys. Traversal operations are useful for tasks such as printing the contents of the B+ tree, performing rangebased operations, or processing the data in a specific order.
 Split and Merge: Split and merge operations are essential for balancing the B+ tree during insertions and deletions. When a node becomes full, it is split into two nodes, and the middle key is promoted to the parent node. Splitting helps maintain the B+ tree’s balance and keeps the height relatively small. Merging is performed when a node becomes less than half full after a deletion, and it is combined with a neighboring node to maintain the B+ tree’s balance.
These are the primary operations performed with a B+ tree. Each operation is designed to efficiently manage the storage and retrieval of data while maintaining the properties and balance of the tree structure.
Compare B Tree and B+ Tree
Here’s a comparison of Btrees and B+ trees in tabular form:
Property  BTree  B+ Tree 
Key Location  Internal nodes and leaf nodes  Leaf nodes only 
Leaf Node Structure  Contains both keys and data  Contains only keys and data 
Index Structure  Internal nodes contain only keys and pointers  Internal nodes contain only keys and pointers 
Sequential Access  Less efficient due to multiple levels  More efficient due to linked list structure 
Range Queries  Less efficient due to internal nodes  More efficient due to linked list structure 
Fanout  Generally smaller  Generally larger 
Storage  More storage space required for keys and data  Less storage space required for keys and data 
Common Use  Database systems, file systems, indexing  Database systems, file systems, indexing 
These are some of the key differences between Btrees and B+ trees. While Btrees and B+ trees have similar structures and properties, B+ trees have some advantages in terms of range queries, sequential access, and storage efficiency. Btrees are often used in scenarios where there is a need to minimize disk I/O and support efficient point queries, while B+ trees are commonly used in database systems and file systems to optimize rangebased operations and sequential access.
Recall B* Tree
B*tree (pronounced “Bstar tree”), it is an extension of the Btree data structure that aims to optimize the space utilization and reduce the tree height further. The B*tree shares many similarities with the Btree but introduces some additional properties.
The key features of a B*tree include:
 Similar structure to a Btree: The B*tree maintains the same balanced tree structure as the Btree, with internal nodes acting as indexes and leaf nodes containing data.
 High occupancy: The B*tree enforces a high occupancy rate for its internal nodes, typically requiring at least twothirds fullness. This property reduces the number of internal nodes and leads to a shallower tree structure.
 Nonroot overflow: Unlike a Btree, a B*tree allows the root node to be less than half full. Instead, it enforces that internal nodes, except the root, should have at least (2/3) * (order – 1) children.
 Key duplication in internal nodes: In a B*tree, internal nodes can store duplicate keys. This feature increases the probability of finding a matching key earlier during search operations.
 Improved space utilization: The high occupancy requirement in internal nodes of a B*tree reduces wasted space and improves the utilization of the tree structure.
 Reduced height: Due to the high occupancy and nonroot overflow properties, B*trees tend to have a shallower height compared to traditional Btrees with similar data sets.
The B*tree aims to strike a balance between space utilization and search efficiency. It achieves this by enforcing higher occupancy in internal nodes and allowing key duplication. These properties result in reduced tree height, faster search operations, and improved space efficiency.
It’s important to note that the B*tree is not as widely adopted as the traditional Btree or B+ tree. It is often considered as a theoretical extension or a variation proposed in research literature rather than a widely implemented data structure.